AU739533B2 - Graphics processor architecture - Google Patents

Description

S&F Ref: 413534D1

AUSTRALIA

PATENTS ACT 1990 COMPLETE SPECIFICATION FOR A STANDARD PATENT

ORIGINAL

**r C' Name and Address of Applicant: Actual Inventor(s): Address for Service: Invention Title: Canon Kabushiki Kaisha 3-30-2, Shimomaruko Ohta-ku Tokyo 146 Japan lan Gibson, Timothy Merrick Long and Christopher Amies be..

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Spruson Ferguson St Martins Tower 31 Market Street Sydney NSW 2000 Graphics Processor Architecture The following statement is a full description of this invention, including the best method of performing it known to me/us:- 5845c GRAPHICS PROCESSOR ARCHITECTURE Field of the Invention The present invention relates to computer architectures, and in particular to architectures dedicated to the creation of graphical images to be printed or displayed.

Background of the Invention An important aspect of the design of any computer architecture is the instruction set, or the way in which instructions are formatted or encoded. Each instruction normally consists of an opcode that is an instruction as to what is to be done to some data, and one or more operand(s) that is the data itself or the address at which the relevant data can be located. Generally the operand(s) occupy a fixed length since this provides the advantage that the length of the instruction is fixed with a large resulting simplification of the associated hardware.

•.In the environment of image processing it is necessary to perform calculations on 15 large streams of data of variable length. This is different from typical computer arrangements which typically have fixed quantities of data. Therefore in image processing it is desirable that the length of the stream of data be specified in some way.

A convention instruction set of prior art computer arrangements requires the .processor to fetch the instruction, decode the instruction, fetch the operand, (4) 20 carry out the calculation, and store the result. There is an appreciable amount of time spent on steps and because they are inherently slow and must be performed for each instruction. Such processors are inherently unsuitable for image processing.

Summary of the Invention It is an object of the present invention to overcome or at least ameliorate one or more of the disadvantages of the prior art.

In accordance with one aspect of the present invention there is disclosed a graphics processor for executing a computer instruction set comprising a plurality of instructions each of which has an instruction opcode and at least one operand, wherein a length of all the instructions is equal and of a like predetermined length, the opcode corresponds to a type of calculation to be performed on the operand(s), each operand is data to be processed in the calculation or specifies an address of the data, a result of the calculation represents processed image data, and each instruction includes a length field that includes data specifying a number of items of data to be processed or, if the number exceeds a size of the length field, a predetermined location of a previously-allocated storage area at which the number is stored, and a flag indicating whether the number is 413534D _claims.doc:eaa stored in the storage area or the length field, whereby said processor for each instruction processes a corresponding number of data items to thereby facilitate processing of variable-length streams of data.

In accordance with another aspect of the present invention there is disclosed a graphics processor for executing a computer instruction set comprising a plurality of instructions each of which has an instruction opcode and at least one operand, wherein the length of all said instructions is equal and of a like predetermined length, said opcode corresponds to a type of calculation to be performed on the operand(s), each operand is data to be processed in said calculation or specifies the address of said data, the result of said calculation represents processed image data, and each said instruction includes a length field containing data specifying a number of items of data to be processed or, if said number exceeds the size of said length field, a predetermined location of a previously allocated storage area at which said number is stored, whereby said processor for each said instruction processes the corresponding said number of data items to thereby s15 facilitate processing of variable length streams of data.

In accordance with another aspect of the present invention there is disclosed a method of executing a computer instruction, wherein said computer instruction comprises an instruction opcode and at least one operand, said opcode corresponding to a type of calculation to be performed on said at least one operand, each said operand being data to 20 be processed in said calculation or specifying the address of said data, and a result of said calculation representing processed image data, said method comprising the steps of: determining a number of items to be processed by said instruction, wherein said instruction includes a length field containing data specifying said number of items of data to be processed or, if said number exceeds the size of said length field, a predetermined location of a previously allocated storage area at which said number is stored, and a flag indicating whether the number is stored in the storage area or the length field; and processing said number of data items by said instruction to thereby facilitate processing of variable length streams of data.

In accordance with other aspects of the invention there is provided a record medium storing computer executable program codes and apparatus, in which the above mentioned method is implemented.

413534D_claims.doc:eaa TABLE OF CONTENTS Brief Description of the Drawings List of Tables Description of the Preferred and Other Embodiments 3.1 General Arrangement of Plural Stream Architecture 3.2 Host/Co-processor Queuing 3.3 Register Description of Co-processor 3.4 Format of Plural Streams Determine Current Active Stream 3.6 Fetch Instruction of Current Active Stream 3.7 Decode and Execute Instruction 3.8 Update Registers of Instruction Controller 3.9 Semantics of the Register Access Semaphore 3.10 Instruction Controller 3.11 Description of a Modules Local Register File 3.12 Register Read/Write Handling 3.13 Memory Area Read/Write Handling 3.14 CBus Structure 3.15 Co-processor Data Types and Data Manipulation 3.16 Data Normalization Circuit 3.17 Image Processing Operations of Accelator Card 3.17.1 Compositing 3.17.2 Color Space Conversion Instructions a. Single Output General Color Space (SOGCS) Conversion Mode b. Multiple Output General Color Space Mode o 3.17.3 JPEG Coding/Decoding a. Encoding b. Decoding 3.17.4 Table Indexing 3.17.5 Data Coding Instructions 3.17.6 A Fast DCT Apparatus 3.17.7 Huffman Decoder 3.17.8 Image Transformation Instructions 3.17.9 Convolution Instructions 3.17.10 Matrix Multiplication 3.17.11 Halftoning 3.17.12 Hierarchial Image Format Decompression 3.17.13 Memory Copy Instructions a. General purpose data movement instructions b. Local DMA instructions 3.17.14 Flow Control Instructions 3.18 Modules of the Accelerator Card 3.18.1 Pixel Organizer 3.18.2 MUV Buffer 3.18.3 Result Organizer 3.18.4 Operand Organizers B and C [O:\CISRA\STAR\MASTERIMSTRV I I IMt- -4 3.18.5 Main Data Path Unit 3.18.6 Data Cache Controller and Cache a. Normal Cache Mode b. The Single Output General Color Space Conversion Mode c. Multiple Output General Color Space Conversion Mode d. JPEG Encoding Mode e. Slow JPEG Decoding Mode f. Matrix Multiplication Mode g. Disabled Mode h. Invalidate Mode 3.18.7 Input Interface Switch 3.18.8 Local Memory Controller 3.18.9 Miscellaneous Module 3.18.10 External Interface Controller 3.18.11 Peripheral Interface Controller APPENDIX A Microprogramming APPENDIX B Register tables IO:\CISRASTAR\MASTER I STRV I IIf, 1XL O 1.0. Brief Description of the Drawings Notwithstanding any other forms which may fall within the scope of the present invention, preferred forms of the invention will now be described, by way of example only. with reference to the accompanying drawings: Fig. 1 illustrates the operation of a raster image co-processor within a host computer environment; Fig. 2 illustrates the raster image co-processor of Fig. 1 in further detail: Fig. 3 illustrates the memory map of the raster image co-processor; Fig. 4 shows the relationship between a CPU. instruction queue, instruction operands and results in shared memory, and a co-processor; Fig. 5 shows the relationship between an instruction generator, memory manager, queue manager and co-processor; Fig. 6 shows the operation of the graphics co-processor reading instructions for execution from the pending instruction queue and placing them on the completed instruction queue; Fig. 7 shows a fixed length circular buffer implementation of the instruction queue, indicating the need to wait when the buffer fills: Fig. 8 illustrates to instruction execution streams as utilized by the coprocessor; Fig. 9 illustrates an instruction execution flow chart; Fig. 10 illustrates the standard instruction word format utilized by the coprocessor; Fig. 11 illustrates the instruction word fields of a standard instruction; 25 Fig. 12 illustrates the data word fields of a standard instruction; Fig. 13 illustrates schematically the instruction controller of Fig. 2; Fig. 14 illustrates the execution controller of Fig. 13 in more detail; Fig. 15 illustrates a state transition diagram of the instruction controller; Fig. 16 illustrates the instruction decoder of Fig. 13: Fig. 17 illustrates the instruction sequencer of Fig. 16 in more detail; Fig. 18 illustrates a transition diagram for the ID sequencer of Fig. 16; Fig. 19 illustrates schematically the prefetch buffer controller of Fig. 13 in more detail: Fig. 20 illustrates the standard form of register storage and module interaction as utilized in the co-processor: Fig. 21 illustrates the format of control bus transactions as utilized in the coprocessor; Fig. 22 illustrates the data flow through a portion of the co-processor; IO:\CISRA\STAR\MIASTERIMSTRVI HMXL -6 Figs. 23-29 illustrate various examples of data reformatting as utilized in the co-processor: Figs. 30 and 31 illustrate the format conversions carried out by the coprocessor; Fig. 32 illustrates the process of input data transformation as carried out in the co-processor; Figs. 33-41 illustrate various further data transformations as carried out by the co-processor; Fig. 42 illustrates various internal to output data transformations carried out by the co-processor; Figs. 43-47 illustrate various further example data transformations carried out by the co-processor; Fig. 48 illustrates various fields utilized by internal registers to determine what data transformations should be carried out; 15 Fig. 49 depicts a block diagram of a graphics subsystem that uses data normalization.; Fig. 50 illustrates a circuit diagram of a data normalization apparatus; Fig. 51 illustrates the pixel processing carried out for compositing operations: Fig. 52 illustrates the instruction word format for compositing operations; Fig. 53 illustrates the data word format for compositing operations; Fig. 54 illustrates the instruction word format for tiling operations; Fig. 55 illustrates the operation of a tiling instruction on an image; Fig. 56 illustrates the process of utilization of interval and fractional tables to re-map color gamuts; 25 Fig. 57 illustrates the form of storage of interval and fractional tables within the MUV buffer of the co-processor; Fig. 58 illustrates the process of color conversion utilising interpolation as carried out in the co-processor; Fig. 59 illustrates the refinements to the rest of the color conversion process at gamut edges as carried out by the co-processor: Fig. 60 illustrates the process of color space conversion for one output color as implemented in the co-processor; Fig. 61 illustrates the memory storage within a cache of the co-processor when utilising single color output color space conversion: Fig. 62 illustrates the methodology utilized for multiple color space conversion; Fig. 63 illustrates the process of address re-mapping for the cache when utilized during the process of multiple color space conversion; ro.\CISRA\STAR\MA ZT1 IMKTR\' I I 1 I -7 Fig. 64 illustrates the instruction word format for color space conversion instructions: Fig. 65 illustrates a method of multiple color conversion: Fig. 66 and 67 illustrate the formation of MCU's during the process of JPEG S conversion as carried out in the co-processor; Fig. 68 illustrates the structure of the JPEG coder of the co-processor; Fig. 69 illustrates the quantizer portion of Fig. 68 in more detail; Fig. 70 illustrates the Huffman coder of Fig. 68 in more detail: Figs. 71 and 72 illustrate the Huffman coder and decoder in more detail; Figs. 73-75 illustrate the process of cutting and limiting of JPEG data as utilized in the co-processor; Fig. 76 illustrates the instruction word format for JPEG instructions; Fig. 77 shows a block diagram of a typical discrete cosine transform apparatus (prior art); 15 Fig. 78 illustrates an arithmetic data path of a prior art DCT apparatus; Fig. 79 shows a block diagram of a DCT apparatus utilized in the coprocessor: Fig. 80 depicts a block diagram of the arithmetic circuit of Fig. 79 in more detail; Fig. 81 illustrates an arithmetic data path of the DCT apparatus of Fig. 79; Fig. 82 presents a representational stream of Huffman-encoded data units interleaved with not encoded bit fields, both byte aligned and not, as in JPEG format; Fig. 83 illustrates the overall architecture of a Huffman decoder of JPEG data of Fig. 84 in more detail; Fig. 84 illustrates the overall architecture of the Huffman decoder of JPEG data; Fig. 85 illustrates data processing in the stripper block which removes byte aligned not encoded bit fields from the input data. Examples of the coding of tags corresponding to the data outputted by the stripper are also shown; Fig. 86 shows the organization and the data flow in the data preshifter; Fig. 87 shows control logic for the decoder of Fig. 81; Fig. 88 shows the organization and the data flow in the marker preshifter; Fig. 89 shows a block diagram of a combinatorial unit decoding Huffman encoded values in JPEG context: Fig. 90 illustrates the concept of a padding zone and a block diagram of the decoder of padding bits: (O:\CISRA\STAR\MASTERIMSTRVI IMXI -8 Fig. 91 shows an example of a format of data outputted by the decoder, the format being used in the co-processor: Fig. 92 illustrates methodology utilized in image transformation instructions: Fig. 93 illustrates the instruction word format for image transformation instructions; Figs 94 and 95 illustrate the format of an image transformation kernal as utilized in the co-processor; Fig. 96 illustrates the process of utilising an index table for image transformations as utilized in the co-processor: Fig. 97 illustrates the data field format for instructions utilising transformations and convolutions; Fig. 98 illustrates the process of interpretation of the bp field of instruction words; Fig. 99 illustrates the process of convolution as utilized in the co-processor: *00, 15 Fig. 100 illustrates the instruction word format for convolution instructions as utilized in the co-processor; Fig. 101 illustrates the instruction word format for matrix multiplication as utilized in the co-processor; Figs 102-105 illustrates the process utilized for hierarchial image manipulation as utilized in the co-processor: Fig. 106 illustrates the instruction word coding for hierarchial image instructions; Fig. 107 illustrates the instruction word coding for flow control instructions as illustrated in the co-processor: Fig. 108 illustrates the pixel organizer in more detail; Fig. 109 illustrates the operand fetch unit of the pixel organizer in more detail: Figs. 110-114 illustrate various storage formats as utilized by the co-processor: Fig. 115 illustrates the MUV address generator of the pixel organizer of the co-processor in more detail; Fig. 116 is a block diagram of a multiple value (MUV) buffer utilized in the co-processor; Fig. 117 illustrates a structure of the encoder of Fig. 116; Fig. 118 illustrates a structure of the decoder of Fig. 116; Fig. 119 illustrates a structure of an address generator of Fig. 116 for generating read addresses when in JPEG mode (pixel decomposition); Fig. 120 illustrates a structure of an address generator of Fig. 116 for generating read addresses when in JPEG mode (pixel reconstruction); [O:\CISRA\STAR\MASTERIMSTRV I IHM XI -9- Fig. 121 illustrates an organization of memory modules comprising the storage 9 device of Fig 116: Fig. 122 illustrates a structure of a circuit that multiplexes read addresses to memory modules: SFig. 123 illustrates a representation of how lookup table entries are stored in the buffer operating in a single lookup table mode; Fig. 124 illustrates a representation of how lookup table entries are stored in the buffer operating in a multiple lookup table mode; Fig. 125 illustrates a representation of how pixels are stored in the buffer operating in JPEG mode (pixel decomposition); Fig. 126 illustrate a representation of how single color data blocks are retrieved from the buffer operating in JPEG mode (pixel reconstruction); Fig. 127 illustrates the structure of the result organizer of the co-processor in *more detail; 15 Fig. 128 illustrates the structure of the operand organizers of the co-processor in more detail; Fig. 129 is a block diagram of a computer architecture for the main data path unit utilized in the co-processor: Fig. 130 is a block diagram of a input interface for accepting, storing and 20 rearranging input data objects for further processing; Fig. 131 is a block diagram of a image data processor for performing arithmetic operations on incoming data objects; *o Fig. 132 is a block diagram of a color channel processor for performing arithmetic operations on one channel of the incoming data objects; Fig. 133 is a block diagram of a multifunction block in a color channel processor: Fig. 134 illustrates a block diagram for compositing operations: Fig. 135 shows an inverse transform of the scanline; Fig. 136 shows a block diagram of the steps required to calculate the value for a designation pixel; Fig. 137 illustrates a block diagram of the image transformation engine; Fig. 138 illustrates the two formats of kernel descriptions; Fig. 139 shows the definition and interpretation of a bp field; Fig. 140 shows a block diagram of multiplier-adders that perform matrix multiplication; Fig. 141 illustrates the control, address and data flow of the cache and cache controller of the co-processor; Fig. 142 illustrates the memory organization of the cache; [O:\CISRA\STAR\MASTERIMSTRV IHMXL 1L 10 Fig. 143 illustrates the address format for the cache controller of the coprocessor; Fig. 144 is a block diagram of a multifunction block in a color channel processor; Fig. 145 illustrates the input interface switch of the co-processor in more Fig.

144 illustrates, a block diagram of the cache and cache controller; Fig. 146 illustrates a four-port dynamic local memory controller of the coprocessor showing the main address and data paths: Fig. 147 illustrates a state machine diagram for the controller of Fig. 146: Fig. 148 is a pseudo code listing detailing the function of the arbitrator of Fig.

146; Fig. 149 depicts the structure of the requester priority bits and the terminology used in Fig. 146.

Fig. 150 illustrates the external interface controller of the co-processor in more 15 detail; Figs. 151-154 illustrate the process of virtual to/from physical address mapping as utilized by the co-processor; SFig. 155 illustrates the IBus receiver unit of Fig. 150 in more detail; Fig. 156 illustrates the RBus receiver unit of Fig. 2 in more detail; Fig. 157 illustrates the memory management unit of Fig. 150 in more detail; Fig. 158 illustrates the peripheral interface controller of Fig. 2 in more detail.

IO:\CISRA\ST'AR\MASTERIMSTR\' IiNIXL II List of Tables Table 1: Register Description Table 2: Opcode Description Table 3: Operand Types Table 4: Operand Descriptors Table 5: Module Setup Order Table 6: CBus Signal Definition Table 7: CBus Transaction Types Table 8: Data Manipulation Register Format Table 9: Expected Data Types Table 10: Symbol Explanation Table 11: Compositing Operations Table 12: Address Composition for SOGCS Mode Table 12A: Instruction Encoding for Color Space Conversion Table 13: Minor Opcode Encoding for Color Conversion Instructions Table 14: Huffman and Quantization Tables as stored in Data Cache Table 15: Fetch Address Table 16: Tables Used by the Huffman Encoder 20 Table 17: Bank Address for Huffman and Quantization Tables Table 18: Instruction Word Minor Opcode Fields Table 19: Instruction Word Minor Opcode Fields Table 20: Instruction Operand and Results Word Table 21: Instruction Word Table 22: Instruction Operand and Results Word Table 23: Instruction Word Table 24: Instruction Operand and Results Word Table 25: Instruction Word Minor Opcode Fields Table 26: Instruction Word Minor Opcode Fields 30 Table 27: Fraction Table [O:\CISRA\STAR\NIASTERJMSTR\ I I-MXL 12 1 3.0 Description of the Preferred and Other Embodiments In the preferred embodiment, a substantial advantage is gained in hardware rasterization by means of utilization of two independent instruction streams by a hardware accelerator. Hence, while the first instruction stream can be preparing a current page for printing, a subsequent instruction stream can be preparing the next page for printing. A high utilization of hardware resources is available especially where the hardware accelerator is able to work at a speed substantially faster than the speed of the output device.

The preferred embodiment describes an arrangement utilising two instruction streams. However, arrangements having further instruction streams can be provided where the hardware trade-offs dictate that substantial advantages can be obtained through the utilization of further streams.

The utilization of two streams allows the hardware resources of the raster 15 image co-processor to be kept fully engaged in preparing subsequent pages or bands, strips, etc., depending on the output printing device while a present page, band, etc is being forwarded to a print device.

S3.1 General Arrangement of Plural Stream Architecture In Fig. 1 there is schematically illustrated a computer hardware arrangement 20 201 which constitutes the preferred embodiment. The arrangement 201 includes a standard host computer system which takes the form of a host CPU 202 interconnected to its own memory store (RAM) 203 via a bridge 204. The host computer system S"provides all the normal facilities of a computer system including operating systems programs, applications, display of information, etc. The host computer system is connected to a standard PCI bus 206 via a PCI bus interface 207. The PCI standard is a well known industry standard and most computer systems sold today, particularly those running Microsoft Windows (trade mark) operating systems, normally come equipped with a PCI bus 206. The PCI bus 206 allows the arrangement 201 to be expanded by means of the addition of one or more PCI cards, eg. 209, each of which contain a further PCI bus interface 210 and other devices 211 and local memory 212 for utilization in the arrangement 201.

In the preferred embodiment, there is provided a raster image accelerator card 220 to assist in the speeding up of graphical operations expressed in a page description language. The raster image accelerator card 220 (also having a PCI bus interface 221) is designed to operate in a loosely coupled, shared memory manner with the host CPU 202 in the same manner as other PCI cards 209. It is possible to add further image accelerator cards 220 to the host computer system as required. The raster image accelerator card is designed to accelerate those operations that form the bulk of the execution complexity in raster image processing operations. These can include: [o:\C0sCRA\srrAR\4ASTFRjMSTRV' I H IMXL 13 Composition Generalized Color Space Conversion JPEG compression and decompression Huffman, run length and predictive coding and decoding Hierarchial image (Trade Mark) decompression Generalized affine image transformations Small kernel convolutions Matrix multiplication Halftoning Bulk arithmetic and memory copy operations The raster image accelerator card 220 further includes its own local memory 223 connected to a raster image co-processor 224 which operates the raster image accelerator card 220 generally under instruction from the host CPU 202. The cooooo processor 224 is preferably constructed as an Application Specific Integrated Circuit 15 (ASIC) chip. The raster image co-processor 224 includes the ability to control at least one printer device 226 as required via a peripheral interface 225. The image accelerator card 220 may also control any input/output device, including scanners.

Additionally, there is provided on the accelerator card 220 a generic external interface 227 connected with the raster image co-processor 224 for its monitoring and testing.

In operation, the host CPU 202 sends, via PCI bus 206, a series of instructions "°and data for the creation of images by the raster image co-processor 224. The data can be stored in the local memory 223 in addition to a cache 230 in the raster image co- °•processor 224 or in registers 229 also located in the co-processor 224.

Turning now to Fig. 2, there is illustrated, in more detail, the raster image coprocessor 224. The co-processor 224 is responsible for the acceleration of the aforementioned operations and consists of a number of components generally under the control of an instruction controller 235. Turning first to the co-processor's communication with the outside world, there is provided a local memory controller 236 for communications with the local memory 223 of Fig. 1. A peripheral interface controller 237 is also provided for the communication with printer devices utilising standard formats such as the Centronics interface standard format or other video interface formats. The peripheral interface controller 237 is interconnected with the local memory controller 236. Both the local memory controller 236 and the external interface controller 238 are connected with an input interface switch 252 which is in turn connected to the instruction controller 235. The input interface switch 252 is also connected to a pixel organizer 246 and a data cache controller 240. The input interface switch 252 is provided for switching data from the external interface controller 238 and local memory controller 236 to the instruction controller 235, the data cache controller 240 and the pixel organizer 246 as required.

1O:\CISRA\STAR\MASTERIMSTRVI IINMXL 14 O For communications with the PCI bus 206 of Fig. 1 the external interface controller 238 is provided in the raster image co-processor 224 and is connected to the instruction controller 235. There is also provided a miscellaneous module 239 which is also connected to the instruction controller 235 and which deals with interactions with the co-processor 224 for purposes of test diagnostics and the provision of clocking and global signals.

The data cache 230 operates under the control of the data cache controller 240 with which it is interconnected. The data cache 230 is utilized in various ways.

primarily to store recently used values that are likely to be subsequently utilized by the co-processor 224. The aforementioned acceleration operations are carried out on plural streams of data primarily by a JPEG coder/decoder 241 and a main data path unit 242.

The units 241, 242 are connected in parallel arrangement to all of the pixel organizer 246 and two operand organizers 247, 248. The processed streams from units 241, 242 og e are forwarded to a results organizer 249 for processing and reformatting where 15 required. Often, it is desirable to store intermediate results close at hand. To this end, in addition to the data cache 230, a multi-used value buffer 250 is provided, interconnected between the pixel organizer 246 and the result organizer 249. for the oooo.

S•storage of intermediate data. The result organizer 249 outputs to the external interface controller 238. the local memory controller 236 and the peripheral interface controller 237 as required.

~As indicated by broken lines in Fig. 2, a further (third) data path unit 243 can.

if required be connected "in parallel" with the two other data paths in the form of JPEG coder/decoder 241 and the main data path unit 242. The extension to 4 or more data paths is achieved in the same way. Although the paths are "parallel" connected, they do not operate in parallel. Instead only one path at a time operates.

The overall ASIC design of Fig. 2 has been developed in the following manner. Firstly, in printing pages it is necessary that there not be even small or transient artefacts. This is because whilst in video signal creation for example, such small errors if present may not be apparent to the human eye (and hence be unobservable), in printing any small artefact appears permanently on the printed page and can sometimes be glaringly obvious. Further, any delay in the signal reaching the printer can be equally disastrous resulting in white, unprinted areas on a page as the page continues to move through the printer. It is therefore necessary to provide results of very high quality, very quickly and this is best achieved by a hardware rather than a software solution.

Secondly, if one lists all the various operational steps (algorithms) required to be carried out for the printing process and provides an equivalent item of hardware for each step, the total amount of hardware becomes enormous and prohibitively expensive.

Also the speed at which the hardware can operate is substantially limited by the rate at 1O:\CISRA\STAR\MASTERIMSTR\' I IMXL 15 which the data necessary for, and produced by, the calculations can be fetched and despatched respectively. That is, there is a speed limitation produced by the limited bandwidth of the interfaces.

However, overall ASIC design is based upon a surprising realization that if the enormous amount of hardware is represented schematically then various parts of the total hardware required can be identified as being duplicated and not operating all the time. This is particularly the case in respect of the overhead involved in presenting the data prior to its calculation.

Therefore various steps were taken to reach the desired state of reducing the amount of hardware whilst keeping all parts of the hardware as active as possible. The first step was the realization that in image manipulation often repetitive calculations of the same basic type were required to be carried out. Thus if the data were streamed in some way, a calculating unit could be configured to carry out a specific type of oooo calculation, a long stream of data processed and then the calculating unit could be reconfigured for the next type of calculation step required. If the data streams were reasonably long, then the time required for reconfiguration would be negligible °compared to the total calculation time and thus throughput would be enhanced.

In addition, the provision of plural data processing paths means that in the event that one path is being reconfigured whilst the other path is being used, then there is substantially no loss of calculating time due to the necessary reconfiguration. This applies where the main data path unit 242 carries out a more general calculation and the other data path(s) carry out more specialized calculation such as JPEC coding and decoding as in unit 241 or, if additional unit 243 is provided, it can provide entropy and/or Huffman coding/decoding.

Further, whilst the calculations were proceeding, the fetching and presenting of data to the calculating unit can be proceeding. This process can be further speeded up, and hardware resources better utilized, if the various types of data are standardized or normalized in some way. Thus the total overhead involved in fetching and despatching data can be reduced.

Importantly, as noted previously, the co-processor 224 operates under the control of host CPU 202 (Fig. In this respect. the instruction controller 235 is responsible for the overall control of the co-processor 224. The instruction controller 235 operates the co-processor 224 by means of utilising a control bus 231, hereinafter known as the CBus. The CBus 231 is connected to each of the modules 236-250 inclusive to set registers (231 of Fig. 1) within each module so as to achieve overall operation of the co-processor 224. In order not to overly complicate Fig. 2, the interconnection of the control bus 231 to each of the modules 236-250 is omitted from Fig. 2.

[O:\CISRA\STAR\MASTER]MSTRV I H MXL 16 O Turning now to Fig. 3. there is illustrated a schematic layout 260 of the available module registers. The layout 260 includes registers 261 dedicated to the overall control of the co-processor 224 and its instruction controller 235. The coprocessor modules 236-250 include similar registers 262.

3.2 Host/Co-processor Queuing With the above architecture in mind, it is clear that there is a need to adequately provide for cooperation between the host processor 202 and the image coprocessor 224. However, the solution to this problem is general and not restricted to the specific above described architecture and therefore will be described hereafter with reference to a more general computing hardware environment.

Modern computer systems typically require some method of memory management to provide for dynamic memory allocation. In the case of a system with one or more co-processors, some method is necessary to synchronize between the *fee dynamic allocation of memory and the use of that memory by a co-processor.

-15 Typically a computer hardware configuration has both a CPU and a specialized co-processor, each sharing a bank of memory. In such a system, the CPU is the only entity in the system capable of allocating memory dynamically. Once allocated by the CPU for use by the co-processor. this memory can be used freely by the co-processor until it is no longer required, at which point it is available to be freed by the CPU.

20 This implies that some form of synchronization is necessary between the CPU and the co-processor in order to ensure that the memory is released only after the co-processor is finished using it. There are several possible solutions to this problem but each has undesirable performance implications.

*9*9 The use of statically allocated memory avoids the need for synchronization, but prevents the system from adjusting its memory resource usage dynamically. Similarly, having the CPU block and wait until the co-processor has finished performing each operation is possible, but this substantially reduces parallelism and hence reduces overall system performance. The use of interrupts to indicate completion of operations by the co-processor is also possible but imposes significant processing overhead if coprocessor throughput is very high.

In addition to the need for high performance, such a system also has to deal with dynamic memory shortages gracefully. Most computer systems allow a wide range of memory size configurations. It is important that those systems with large amounts of memory available make full use of their available resources to maximize performance. Similarly those systems with minimal memory size configurations should still perform adequately to be useable and, at the very least, should degrade gracefully in the face of a memory shortage.

To overcome these problems, a synchronization mechanism is necessary which will maximize system performance while also allowing co-processor memory usage to 1O:\CIS RA\STAR\MASTERINISTRV I 11MXL 17adjust dynamically to both the capacity of the system and the complexity of the operation being performed.

In general, the preferred arrangement for synchronising the (host) CPU and the co-processor is illustrated in Fig. 4 where the reference numerals used are those already utilized in the previous description of Fig. 1.

Thus in Fig. 108, the CPU 202 is responsible for all memory management in the system. It allocates memory 203 both for its own uses, and for use by the coprocessor 224. The co-processor 224 has its own graphics-specific instruction set, and is capable of executing instructions 1022 from the memory 203 which is shared with the host processor 202. Each of these instructions can also write results 1024 back to the shared memory 203, and can read operands 1023 from the memory 203 as well. The amount of memory 203 required to store operands 1023 and results 1024 of coprocessor instructions varies according to the complexity and type of the particular operation.

15 The CPU 202 is also responsible for generating the instructions 1022 executed by the co-processor 224. To maximize the degree of parallelism between the CPU 202 and the co-processor 224, instructions generated by the CPU 202 are queued as •indicated at 1022 for execution by the co-processor 224 Each instruction in the queue 1022 can reference operands 1023 and results 1024 in the shared memory 203, which 20 has been allocated by the host CPU 202 for use by the co-processor 224.

The method utilizes an interconnected instruction generator 1030, memory manager 1031 and queue manager 1032, as shown in Fig. 5. All these modules execute in a single process on the host CPU 202.

Instructions for execution by the co-processor 224 are generated by the instruction generator 1030, which uses the services of the memory manager 1031 to allocate space for the operands 1023 and results 1024 of the instructions being generated. The instruction generator 1030 also uses the services of the queue manager 1032 to queue the instructions for execution by the co-processor 224.

Once each instruction has been executed by the co-processor 224, the CPU 202 can free the memory which was allocated by the memory manager 1031 for use by the operands of that instruction. The result of one instruction can also become an operand for a subsequent instruction, after which its memory can also be freed by the CPU.

Rather than fielding an interrupt, and freeing such memory as soon as the co-processor 224 has finished with it, the system frees the resources needed by each instruction via a cleanup function which runs at some stage after the co-processor 224 has completed the instruction. The exact time at which these cleanups occur depends on the interaction between the memory manager 1031 and the queue manager 1032, and allows the system to adapt dynamically according to the amount of system memory available and the amount of memory required by each co-processor instruction.

IO:\CISR\STAR\MASTERIMSTRV I IW IXL 18- O Fig. 6 schematically illustrates the implementation of the co-processor instruction queue 1022. Instructions are inserted into a pending instruction queue 1040 by the host CPU 202. and are read by the co-processor 224 for execution. After execution by the co-processor 224. the instructions remain on a cleanup queue 1041. so that the CPU 202 can release the resources that the instructions required after the coprocessor 224 has finished executing them.

The instruction queue 1022 itself can be implemented as a fixed or dynamically sized circular buffer. The instruction queue 1022 decouples the generation of instructions by the CPU 202 from their execution by the co-processor 224.

Operand and result memory for each instruction is allocated by the memory manager 1031 (Fig. 5) in response to requests from the instruction generator 1030 during instruction generation. It is the allocation of this memory for newly generated instructions which triggers the interaction between the memory manager 1031 and the queue manager 1032 described below, and allows the system to adapt automatically to IS1 the amount of memory available and the complexity of the instructions involved.

S•The instruction queue manager 1032 is capable of waiting for the co-processor 224 to complete the execution of any given instruction which has been generated by the instruction generator 1030. However, by providing a sufficiently large instruction queue 1022 and sufficient memory 203 for allocation by the memory manager 1031, it becomes possible to avoid having to wait for the co-processor 224 at all, or at least until the very end of the entire instruction sequence, which can be several minutes on a very large job. However, peak memory usage can easily exceed the memory available, and at this point the interaction between the queue manager 1032 and the memory manager 1031 comes into play.

The instruction queue manager 1032 can be instructed at any time to "cleanup" "the completed instructions by releasing the memory that was dynamically allocated for them. If the memory manager 1031 detects that available memory is either running low or is exhausted, its first recourse is to instruct the queue manager 1032 to perform such a cleanup in an attempt to release some memory which is no longer in use by the coprocessor 224. This can allow the memory manager 1031 to satisfy a request from the instruction generator 1030 for memory required by a newly generated instruction, without the CPU 202 needing to wait for, or synchronize with, the co-processor 224.

If such a request made by the memory manager 1031 for the queue manager 1032 to cleanup completed instructions does not release adequate memory to satisfy the instruction generator's new request. the memory manager 1031 can request that the queue manager 1032 wait for a fraction, say half, of the outstanding instructions on the pending instruction queue 1040 to complete. This will cause the CPU 202 processing to block until some of the co-processor 224 instructions have been completed, at which point their operands can be freed. which can release sufficient memory to satisfy the 1O:\CISRA\STAR\MASTERIMSTRV I HMXL 19 S. request. Waiting for only a fraction of the outstanding instructions ensures that the coprocessor 224 is kept busy by maintaining at least some instructions in its pending instruction queue 1040. In many cases the cleanup from the fraction of the pending instruction queue 1040 that the CPU 202 waits for, releases sufficient memory for the memory manager 1031 to satisfy the request from the instruction generator 1030.

In the unlikely event that waiting for the co-processor 224 to complete execution of, say, half of the pending instructions does not release sufficient memory to satisfy the request, then the final recourse of the memory manager 1031 is to wait until all pending co-processor instructions have completed. This should release sufficient resources to satisfy the request of the instruction generator 1030, except in the case of extremely large and complex jobs which exceed the system's present memory capacity altogether.

By the above described interaction between the memory manager 1031 and the queue manager 1032, the system effectively tunes itself to maximize throughput for the given amount of memory 203 available to the system. More memory results in less need for synchronization and hence greater throughput. Less memory requires the CPU 202 to wait more often for the co-processor 224 to finish using the scarce memory 203, thereby yielding a system which still functions with minimal memory available, but at a lower performance.

20 The steps taken by the memory manager 1031 when attempting to satisfy a request from the instruction generator 1030 are summarized below. Each step is tried in sequence, after which the memory manager 1031 checks to see if sufficient memory 203 has been made available to satisfy the request. If so, it stops because the request can be satisfied; otherwize it proceeds to the next step in a more aggressive attempt to satisfy the request: 1. Attempt to satisfy the request with the memory 203 already available.

2. Cleanup all completed instructions.

3. Wait for a fraction of the pending instructions.

4. Wait for all the remaining pending instructions.

Other options can also be used in the attempt to satisfy the request, such as waiting for different fractions (such as one-third or two-thirds) of the pending instructions, or waiting for specific instructions which are known to be using large amounts of memory.

Turning now to Fig. 7. in addition to the interaction between the memory manager 1031 and the queue manager 1032. the queue manager 1032 can also initiate a synchronization with the co-processor 224 in the case where space in a fixed-length instruction queue buffer 1050 is exhausted. Such a situation is depicted in Fig. 7. In Fig. 7 the pending instructions queue 1040 is ten instructions in length. The latest instruction to be added to the queue 1040 has the highest occupied number. Thus IO:\CISRA\STAR\NIASTERIMSTR\'I I- tM1XL 20 O where space is exhausted the latest instruction is located at position 9. The next instruction to be input to the co-processor 224 is waiting at position zero.

In such a case of exhausted space, the queue manager 1032 will also wait for, say, half the pending instructions to be completed by the co-processor 224. This delay normally allows sufficient space in the instruction queue 1040 to be freed for new instructions to be inserted by the queue manager 1032.

The method used by the queue manager 1032 when scheduling new instructions is as follows: 1. Test to see if sufficient space is available in the instruction queue 1040.

2 If sufficient space is not available, wait for the co-processor to complete some predetermined number or fraction of instructions.

3. Add the new instructions to the queue.

The method used by the queue manager 1032 when asked to wait for a given instruction is as follows: 1. Wait until the co-processor 224 indicates that the instruction is complete.

2. While there are instructions completed which are not yet cleaned up, clean up the next completed instruction in the queue.

The method used by the instruction generator 1030 when issuing new instructions is as follows: 20 1. Request sufficient memory for the instruction operands 1023 from the memory manger 1031.

2. Generate the instructions to be submitted.

3. Submit the co-processor instructions to the queue manager 1032 for execution.

The following is an example of pseudo code of the above decision making processes.

MEMORY MANAGER ALLOCATE MEMORY

BEGIN

IF sufficient memory is NOT available to satisfy request

THEN

Clean up all completed instructions.

ENDIF

IF sufficient memory is still NOT available to satisfi request

THEN

CALL WAIT_FOR_INSTRUCTIONfor half the pending instructions.

ENDIF

IO:\CISR\STAR\NASTERJMSTRV I 1iMXL 21 IF sufficient nmemoir- is still NOT available to satisfy request

THEN

RETURN wcith an error.

ENDIF

RETURN the allocated memory-

END

QUEUE MANAGER SCHEDULE INSTRUCTION

BEGIN

I 0 IF sufficient space is NOT available in the instruction queue

THEN

WAIT for the co-processor to complete some predetermined number of instructions.

ENDIF

15 Add the new instructions to the queue.

END

*WAITFOR INSTRUCTION(i)

•BEGIN

WAIT until the co-processor indicates that instruction i is complete.

20 WHILE there are instructions completed which are not yet cleaned up

DO

IF the next completed instruction has a cleanup function

THEN

CALL the cleanup function

ENDIF

REMOVE the completed instruction from the queue

DONE

END

INSTRUCTION GENERA TOR GENERATE INSTRUCTIONS

BEGIN

CALL ALLOCATE MEMORY to allocate sufficient memory for the instructions operands from the memory manager.

GENERATE the instructions to be submitted.

CALL SCHEDULE INSTRUCTION submit the co-processor instructions to the queue manager for execution.

END

IO\CISRA\STAR\MASTERIMSTRV I Ht'IXL a a.

22 3.3 Register Description of Co-processor As explained above in relation to Figs. 1 and 3, the co-processor 224 maintains various registers 261 for the execution of each instruction stream.

Referring to each of the modules of Fig. 2. Table 1 sets out the name, type and description of each of the registers utilized by the co-processor 224 while Appendix B sets out the structure of each field of each register.

Table 1: Register Description NAME TYPE DESCRIPTION External Interface Controller Registers eic_cfg Config2 Configuration eic stat Status Status eicerrint Interrupt Error and Interrupt Status eic err int en Config2 Error and Interrupt Enable eictest Config2 Test modes eic_gen_pob Config2 Generic bus programmable output bits eic_high_addr Configl Dual address cycle offset eic wtlbv Control2 Virtual address and operation bits for TLB Invalidate/Write eic_wtlb_p Config2 Physical address and control bits for TLB Write eic mmuv Status Most recent MMU virtual address translated, and current LRU location.

eic mmuv Status Most recent page table physical address fetched by MMU.

eic_ip_addr Status Physical address for most recent IBus access to the PCI Bus.

eic_rp_addr Status Physical address for most recent RBus access to the PCI Bus.

eic_ig_addr Status Address for most recent IBus access to the Generic Bus.

eic_rg_data Status Address for most recent RBus access to the Generic Bus.

IO:\CISRA\STAR\MASTER 5TRV I I110XL 23 NAME TYPE _DESCRIPTION Local Memory Controller Registers Imi cfg Control2 General configuration register Imi sts Status General status register Imierrint Interrupt Error and interrupt status register Imi err int en Control2 Error and interrupt enable register Imi dcfg Control2 DRAM configuration register Imi mode Control2 SDRAM mode register Peripheral Interface Controller Registers pic_cfg Config2 Configuration pic_stat Status Status pic_errint Interrupt Interrupt/Error Status pic err inten Config2 Interrupt/Error Enable pic_abus_cfg Control2 Configuration and control for ABus pic_abus_addr Config 1 Start address for ABus transfer pic_cent_cfg Control2 Configuration and control for Centronics pic_cent_dir Config2 Centronics pin direct control register pic_reverse_cfg Control2 Configuration and control for reverse (input) data transfers pic_timer0 Config 1 Initial data timer value pictimerl Config Subsequent data timer value Miscellaneous Module Registers mm_cfg Config2 Configuration Register mm stat Status Status Register mm err int Interrupt Error and Interrupt Register mm err int en Config2 Error and Interrupt Masks mm_gefg Config2 Global Configuration Register mm diag Config Diagnostic Configuration Register mm grst Config Global Reset Register mm gerr Config2 Global Error Register mmgexp Config2 Global Exception Register mm gint Config2 Global Interrupt Register mm active Status Global Active signals [O:\CISRA\STAR\NIASTERIMSTR\' I I MXL 24 NAME TYPE DESCRIPTION Instruction Controller Registers ic_cfg Config2 Configuration Register icstat Status/ Status Register Interrupt icerrint Interrupt Error and Interrupt Register (write to clear error and interrupt) ic err int en Config2 Error and Interrupt Enable Register ic_ipa Controll A stream Instruction Pointer ictda Config A stream Todo Register ic fna Control A stream Finished Register icinta Config1 A stream Interrupt Register icloa Status A stream Last Overlapped Instruction Sequence number ic_ipb Controll B stream Instruction Pointer ic tdb Configl B stream Todo Register icfnb Controll B stream Finished Register icintb Configl B stream Interrupt Register iclob Status B stream Last Overlapped Instruction Sequence number ic sema Status A stream Semaphore ic semb Status B stream Semaphore Data Cache Controller Registers dcc_cfgl Config2 DCC configuration 1 register dcc stat Status state machine status bits dcc err int Status DCC error status register dec err int en Controll DCC error interrupt enable bits dcccfg2 Control2 DCC configuration 2 register dccaddr Configl Base address register for special address modes.

dcc Iv0 Controll "valid" bit status for lines 0 to 31 dcc lvl Controll "valid" bit status for lines 32 to 63 dcc lv2 Controll "valid" bit status for lines 64 to dccl v3 Controll "valid" bit status for lines 96 to 127 dcc raddrb Status Operand Organizer B request address dccraddrc Status Operand Organizer C request address ga [O:\CISR.A\STAR\MASTER IMSTRV III MXL 25 p p. p p **pp NAME TYPE DESCRIPTION dcctest Controll DCC test register Pixel Organizer Registers pocfg Config2 Configuration Register postat Status Status Register po_err_int Interrupt Error/Interrupt Status Register po err int en Config2 Error/Interrupt Enable Register po_dmr Config2 Data Manipulation Register po_subst Config2 Substitution Value Register po_cdp Status Current Data Pointer polen Controll Length Register po_said Controll Start Address or Immediate Data po_idr Control2 Image Dimensions Register po_muv_valid Control2 MUV valid bits po_muv Config Base address of MUV RAM Operand Organizer B Registers oob_cfg Config2 Configuration Register oob stat Status Status Register oob err int Interrupt Error/Interrupt Register oob err int en Config2 Error/Interrupt Enable Register oobdmr Config2 Data Manipulation Register oobsubst Config2 Substitution Value Register oob_cdp Status Current Data Pointer ooblen Controll Input Length Register oob said Controll Operand Start Address oob tile Controll Tiling lengthloffset Register Operand Organizer C Registers ooccfg Config2 Configuration Register ooc stat Status Status Register oocerrint Interrupt Error/Interrupt Register ooc err int en Config2 Error/Interrupt Enable Register ooc dmr Config2 Data Manipulation Register oocsubst Config2 Substitution Value Register ooc_cdp Status Current Data Pointer ooc len Controll Input Length Register ooc said Control 1 Operand Start Address [O:\CISRA\STAR\MASTERIMSTRVI HM1XL 26

S

S. S NAME TYPE DESCRIPTION ooc tile Controll Tiling length/offset Register JPEG Coder Register jccfg Config2 configuration jcstat Status status jc err int Interrupt error and interrupt status register jc err int en Config2 error and interrupt enable register jc_rsi Config restart interval jcdecode Control2 decode of current instruction jcres Control 1 residual value jctable_sel Control2 table selection from decoded instruction Main Data Path Register mdp_cfg Config2 configuration mdp_stat Status status mdperrint Interrupt error/interrupt mdp_err inten Config2 error/interrupt enable mdp_test Config2 test modes mdp_opl Control2 current operation 1 mdpop2 Control2 current operation 2 mdp_por Control 1 offset for plus operator mdp_bi Control 1 blend start/offset to index table entry mdp_bm Control 1 blend end or number of rows and columns in matrix, binary places, and number of levels in halftoning mdplen Controll Length of blend to produce Result Organizer Register ro cfg Config2 Configuration Register ro stat Status Status Register ro err int Interrupt Error/Interrupt Register ro err int en Config2 Error/Interrupt Enable Register ro dmr Config2 Data Manipulation Register ro subst Configl Substitution Value Register rocdp Status Current Data Pointer ro len Status Output Length Register ro sa Configl Start Address ro idr Configl Image Dimensions Register 55 S S S 5

S

S

S. S

S

55..

[O\CISRA\STAR\MASTERIMSTRVI II MXL 27 NAME TYPE DESCRIPTION ro vbase Config1 co-processor Virtual Base Address ro cut Configl Output Cut Register roImt Config I Output Length Limit PCIBus Configuration Space alias A read only copy of PCI configuration space registers Ox0 to OxD and OxF.

pci_external_cfg Status 32-bit field downloaded at reset from an external serial ROM. Has no influence on coprocessor operation.

Input Interface Switch Registers iis_cfg Config2 Configuration Register iis stat Status Status Register iis err int Interrupt Interrupt/Error Status Register iis err int en Config2 Interrupt/Error Enable Register iis ic addr Status Input address from IC iis doc addr Status Input address from DCC iis_po_addr Status Input address from PO iis burst Status Burst Length from PO, DCC IC iisbaseaddr Configl Base address of co-processor memory object in host memory map.

iis test Configl Test mode register The more notable ones of these registers include: Instruction Pointer Registers (ic_ipa and ic_ipb). This pair of registers each contains the virtual address of the currently executing instruction.

Instructions are fetched from ascending virtual addresses and executed. Jump instruction can be used to transfer control across non-contiguous virtual addresses.

Associated with each instruction is a 32 bit sequence number which increments by one per instruction. The sequence numbers are used by both the co-processor 224 and by the host CPU 202 to synchronize instruction generation and execution.

Finished Registers (ic_fna and ic_fnb). This pair of registers each contains a sequence number counting completed instructions.

Todo Register (ic_tda and ic_tdb). This pair of registers each contains a sequence number counting queued instructions.

Interrupt Register (icinta and icintb). This pair of registers each contains a sequence number at which to interrupt.

[O:\CISRA\STAR\N1ASTERIMSTRV I HNXL 28- Interrupt Status Registers (icstat.arimed and ic_stat.b_primed).

This pair of registers each contains a primed bit which is a flag enabling the interrupt following a match of the Interrupt and Finished Registers. This bit appears alongside other interrupt enable bits and other status/configuration information in the Interrupt Status (ic stat) register.

Register Access Semaphores (ic_sema and ic_semb). The host CPU 202 must obtain this semaphore before attempting register accesses to the co-processor 224 that requires atomicity, ie. more than one register write. Any register accesses not requiring atomicity can be performed at any time. A side effect of the host CPU 202 obtaining this semaphore is that co-processor execution pauses once the currently executing instruction has completed. The Register Access Semaphore is implemented as one bit of the configuration/status register of the co-processor 224. These registers are stored in the Instruction Controllers own register area. As noted previously, each sub-module of the co-processor has its own set of configuration and status registers.

:.15 These registers are set in the course of regular instruction execution. All of these registers appear in the register map and many are modified implicitly as part of instruction execution. These are all visible to the host via the register map.

3.4 Format of Plural Streams As noted previously, the co-processor 224, in order to maximize the utilization of its resources and to provide for rapid output on any external peripheral device.

executes one of two independent instruction streams. Typically, one instruction stream is associated with a current output page required by an output device in a timely manner, while the second instruction stream utilizes the modules of the co-processor ~224 when the other instruction stream is dormant. Clearly, the overriding imperatives are to provide the required output data in a timely manner whilst simultaneously ~attempting to maximize the use of resources for the preparation of subsequent pages.

~bands, etc. The co-processor 224 is therefore designed to execute two completely independent but identically implemented instruction streams (hereafter termed A and The instructions are preferably generated by software running on the host CPU 202 (Fig. 1) and forwarded to the raster image acceleration card 220 for execution by the co-processor 224. One of the instruction streams (stream A) operates at a higher priority than the other instruction stream (stream B) during normal operation. The stream or queue of instructions is written into a buffer or list of buffers within the host RAM 203 (Fig. 1) by the host CPU 202. The buffers are allocated at start-up time and locked into the physical memory of the host 203 for the duration of the application.

Each instruction is preferably stored in the virtual memory environment of the host RAM 203 and the raster image co-processor 224 utilizes a virtual to physical address translation scheme to determine a corresponding physical address with the in-host RAM I HMNL 29 203 for the location of a next instruction. These instructions may alternatively be stored in the co-processors 224 local memory.

Turning now to Fig. 8, there is illustrated the format of two instruction streams A and B 270. 271 which are stored within the host RAM 203. The format of Seach of the streams A and B is substantially identical.

Briefly, the execution model for the co-processor 224 consists of: S Two virtual streams of instructions, the A stream and the B stream.

S In general only one instruction is executed at a time.

S Either stream can have priority, or priority can be by way of "round robin".

S Either stream can be 'locked" in. ie. guaranteed to be executed regardless of stream priorities or availability of instructions on the other stream.

S Either stream can be empty.

Either stream can be disabled.

.15 Either stream can contain instructions that can be "overlapped", ie.

execution of the instruction can be overlapped with that of the following instruction if the following instruction is not also "overlapped".

Each instruction has a "unique" 32 bit incrementing sequence number.

S Each instruction can be coded to cause an interrupt, and/or a pause in instruction execution.

Instructions can be speculatively prefetched to minimize the impact of external interface latency.

:The instruction controller 235 is responsible for implementing the coprocessor's instruction execution model maintaining overall executive control of the coprocessor 224 and fetching instructions from the host RAM 203 when required. On a :-per instruction basis, the instruction controller 235 carries out the instruction decoding and configures the various registers within the modules via CBus 231 to force the corresponding modules to carry-out that instruction.

Turning now to Fig. 9, there is illustrated a simplified form of the instruction execution cycle carried out by the instructions controller 235. The instruction execution cycle consists of four main stages 276-279. The first stage 276 is to determine if an instruction is pending on any instruction stream. If this is the case, an instruction is fetched 277, decoded and executed 278 by means of updating registers 279.

3.5 Determine Current Active Stream In implementing the first stage 276, there are two steps which must be taken: 1. Determine whether an instruction is pending; and 2. Decide which stream of instructions should be fetched next.

IO:\CISRA\STAR\ ASTERIMSTRV I HMXL 30 In determining whether instructions are pending the following possible conditions must be examined: 1. whether the instruction controller is enabled; 2. whether the instruction controller is paused due to an internal error or interrupt; 3. whether there is any external error condition pending; 4. whether either of the A or B streams are locked; whether either stream sequence numbering is enabled; and 6. whether either stream contains a pending instruction.

The following pseudo code describes the algorithm for determining whether an instruction is pending in accordance with the above rules. This algorithm can be hardware implemented via a state transition machine within the instruction controller 235 in known manner: 15 if not error and enabled and not bypassed and not self test mode A stream locked and not paused if A stream enabled and (A stream sequencing disabled or instruction on A stream) instruction pending 20 else no instruction pending end if else "if B stream locked and not paused if B stream enabled and (B stream 'e sequencing disabled or instruction on B stream) "instruction pending else no instruction pending end if else no stream is locked if (A stream enabled and not paused and (A stream sequencing disabled or instruction on A stream)) or (B stream enabled and not paused and (B stream sequencing disabled or instruction on B stream)) instruction pending else no instruction pending end if IO:\CISRAASARWASTERIMSTRV I 1I XL 31 end if 0 else interface controller not enabled no instruction pending end if If no instruction is found pending, then the instruction controller 235 will "spin" or idle until a pending instruction is found.

To determine which stream is "active", and which stream is executed next, the following possible conditions are examined: 1. whether either stream is locked; 2. what priority is given to the A and B streams and what the last instruction stream was; 3. whether either stream is enabled; and 4. whether either stream contains a pending instruction.

15 The following pseudo code implemented by the instruction controller describes how to determine the next active instruction stream: if A stream locked next stream is A 20 else if B stream locked next stream is B else no stream is locked if (A stream enabled and (A stream sequencing disabled or instruction on A stream)) and not (B stream enabled and (B stream sequencing disabled or instruction on B stream)) next stream is A else if (B stream enabled and (B stream sequencing disabled or instruction on B stream)) and not (A stream enabled and (A stream sequencing disabled or instruction on A stream)) next stream is B else both stream have instruction if pri 0 A high, B low next stream is A else if pri 1 A low, B high next stream is B else if pri 2 or 3 round robin if last stream is A next stream is B else

INIXL

32 next stream is A Or end (f end if end if end (f As the conditions can be constantly changing, all conditions must be determined together atomically.

3.6 Fetch Instruction of Current Active Stream After the next active instruction stream is determined, the Instruction Controller 235 fetches the instruction using the address in the corresponding instruction pointer register (ic_ipa or ic_ipb). However, the Instruction Controller 235 does not fetch an instruction if a valid instruction already exists in a prefetch buffer stored within the instruction controller 235.

15 A valid instruction is in the prefetch buffer if: 1. the prefetch buffer is valid; and 2. the instruction in the prefetch buffer is from the same stream as the currently active stream.

The validity of the contents of the prefetch buffer is indicated by a prefetch bit 20 in the ic_stat register, which is set on a successful instruction prefetch. Any external *I write to any of the registers of the instruction controller 235 causes the contents of the prefetch buffer to be invalidated.

3.7 Decode and Execute Instruction Once an instruction has been fetched and accepted the instruction controller 235 decodes it and configures the registers 229 of the co-processor 224 to execute the instruction.

The instruction format utilized by the raster image co-processor 224 differs from' traditional processor instruction sets in that the instruction generation must be carried out instruction by instruction by the host CPU 202 and as such is a direct overhead for the host. Further, the instructions should be as small as possible as they must be stored in host RAM 203 and transferred over the PCI bus 206 of Fig. 1 to the co-processor 224. Preferably, the co-processor 224 can be set up for operation with only one instruction. As much flexibility as possible should be maintained by the instruction set to maximize the scope of any future changes. Further, preferably any instruction executed by the co-processor 224 applies to a long stream of operand data to thereby achieve best performance. The co-processor 224 employs an instruction decoding philosophy designed to facilitate simple and fast decoding for "typical instructions" yet still enable the host system to apply a finer control over the operation of the co-processor 224 for "atypical" operations.

1O:\CISRA\.STAR\NASTERIMSTRV I H1XL 33 4 Turning now to Fig. 10, there is illustrated the format of a single instruction 280 which comprizes eight words each of 32 bits. Each instruction includes an instruction word or opcode 281, and an operand or result type data word 282 setting out the format of the operands. The addresses 283-285 of three operands A, B and C are also provided, in addition to a result address 286. Further, an area 287 is provided for use by the host CPU 202 for storing information relevant to the instruction.

The structure 290 of an instruction opcode 281 of an instruction is illustrated in Fig. 11. The instruction opcode is 32 bits long and includes a major opcode 291, a minor opcode 292, an interrupt bit 293, a partial decode (Pd) bit 294, a register length bit 295, a lock bit 296 and a length 297. A description of the fields in the instruction word 290 is as provided by the following table.

Table 2: Opcode Description Field Description major opcode Instruction category 0: Reserved 1: General Colour Space Conversion 2: JPEG Compression and Decompression 3: Matrix Multiplication 4: Image Convolutions Image Transformations 6: Data Coding 7: Halftone 8: Hierarchial image decompression 9: Memory Copy Internal Register and Memory Access 11: Instruction Flow Control 12: Compositing 13: Compositing 14: Reserved Reserved minor opcode Instruction detail. The coding of this field is dependent on the major opcode.

I 1 Interrupt and pause when competed, 0 Don't interrupt and pause when completed 9 5 [O:\CISRASTAR\MASTERIMSTRV I 34 0 0 0 Field Description pd Partial Decode 1 use the "partial decode" mechanism.

0 Don't use the "partial decode" mechanism R 1 length of instruction is specified by the Pixel Organizer's input length register (po_len) 0 length of instruction is specified by the opcode length field.

L 1 this instruction stream (A or B) is "locked" for the next instruction.

0 this instruction stream (A or B) is not "locked" in for the next instruction.

length number of data items to read or generate By way of discussion of the various fields of an opcode, by setting the I-bit field 293. the instruction can be coded such that instruction execution sets an interrupt and pause on completion of that instruction. This interrupt is called an "instruction 5 completed interrupt". The partial decode bit 294 provides for a partial decode mechanism such that when the bit is set and also enabled in the ic_cfg register, the various modules can be micro coded prior to the execution of the instruction in a manner which will be explained in more detail hereinafter. The lock bit 296 can be utilized for operations which require more than one instruction to set up. This can involve setting various registers prior to an instruction and provides the ability to "lock" in the current instruction stream for the next instruction. When the L-bit 296 is set, once an instruction is completed, the next instruction is fetched from the same stream. The length field 297 has a natural definition for each instruction and is defined in terms of the number of "input data items" or the number of "output data items" as required. The length field 297 is only 16 bits long. For instructions operating on a stream of input data items greater than 64,000 items the R-bit 295 can be set, in which case the input length is taken from a po_len register within the pixel organizer 246 of Fig. 2. This register is set immediately before such an instruction.

Returning to Fig. 10, the number of operands 283-286 required for a given instruction varies somewhat depending on the type of instruction utilized. The following table sets out the number of operands and length definition for each instruction type: 1o:\CISRASTAR\1ASTERIMSTRVI I I MXL 35 Table 3: Operand Types Instruction Length defined by of Class operands Compositing input pixels 3 General Color Space Conversion input pixels 2 JPEG decompression/compression input bytes 2 other decompression/compression input bytes 2 Image Transformations and output bytes 2 Convolutions Matrix Multiplication input pixels 2 Halftoning input pixels, bytes 2 Memory Copying input pixels, bytes 1 Hierarchial Image Decompression input pixels, bytes 1 or 2 Flow Control fixed fixed 2 Internal Access Instructions fixed fixed 4 Turning now to Fig. 12, there is illustrated. firstly, the data word format 300 of the data word or operand descriptor 282 of Fig. 10 for three operand instructions and, secondly, the data word format 301 for two operand instructions. The details of the encoding of the operand descriptors are provided in the following table: Table 4: Operand Descriptors Field Description what 0 instruction specific mode: This indicates that the remaining fields of the descriptor will be interpreted in line with the major opcode. Instruction specific modes supported are: major opcode 0-11: Reserved major opcode 12-13: (Compositing): Implies that Operand C is a bitmap attenuation. The occ dmr register will be set appropriately, with the cc= 1 and normalize=0 major opcode 14-15: Reserved 1 sequential addressing 2 tile addressing 3 constant data [OS\CISRA\STAR\MASTER1MSTRV I HNXl[ -36 Field Description L 0 not long: immediate data I long: pointer to data if internal format: 0 pixels 1 unpacked bytes 2 packed bytes 3 other S 0 set up Data Manipulation Register as appropriate for this operand I use the Data Manipulation Register as is C 0 not cacheable 1 cacheable Note: In general a performance gain will be achieved if an operand is specified as cacheable. Even operands displaying low levels of referencing locality (such as sequential data) still benefit from being cached as it allows data to be burst transferred to the host processor and is more efficient.

P external format: 0 unpacked bytes 1 packed stream bit offset. Specifies the offset within a byte of the start of bitwize data.

R 0 Operand C does not describe a register to set.

1 Operand C describes a register to set.

This bit is only relevant for instructions with less than three operands.

With reference to the above table, it should be noted that, firstly, in respect of the constant data addressing mode. the co-processor 224 is set up to fetch, or otherwize calculate, one internal data item, and use this item for the length of the instruction for that operand. In the tile addressing mode. the co-processor 224 is set up to cycle through a small set of data producing a "tiling effect". When the L-bit of an operand descriptor is zero then the data is immediate, ie. the data items appear literally in the operand word.

IO:\CISRASTAR\M ASTERIMSTRV I INIX-L 37 Returning again to Fig. 10, each of the operand and result words 283-286 contains either the value of the operand itself or a 32-bit virtual address to the start of the operand or result where data is to be found or stored.

The instruction controller 235 of Fig. 2 proceeds to decode the instruction in two stages. It first checks to see whether the major opcode of the instruction is :valid, raising an error if the major opcode 291 (Fig. 11) is invalid. Next, the instruction is executed by the instruction controller 235 by means of setting the various registers via CBus 231 to reflect the operation specified by the instruction. Some instructions can require no registers to be set.

The registers for each module can be classified into types based on their behavior. Firstly, there is the status register type which is "read only" by other modules and "read/write" by the module including the register. Next, a first type of configuration register, hereinafter called "configl", is "read/write" externally by the modules and "read only" by the module including the register. These registers are normally used for holding larger type configuration information, such as address values. A second type of configuration register, herein known as "config2", is readable and writable by any module but is read only by the module including the register. This type of register is utilized where bit by bit addressing of the register is required.

A number of control type registers are provided. A first type, hereinafter known as "controll" registers, is readable and writable by all modules (including the module which includes the register). The controll registers are utilized for holding large control information such as address values. Analogously, there is further provided a second type of control register, hereinafter known as "control2", which can be set on a bit by bit basis.

A final type of register known as an interrupt register has bits within the register which are settable to 1 by the module including the register and resettable to zero externally by writing a to the bit that has been set. This type of register is utilized for dealing with the interrupts/errors flagged by each of the modules.

Each of the modules of the co-processor 224 sets a cactive line on the CBus 231 when it is busy executing an instruction. The instruction controller 235 can then determine when instructions have been completed by "OR-ing" the c_active lines coming from each of the modules over the CBus 231. The local memory controller module 236 and the peripheral interface controller module 237 are able to execute overlapped instructions and include a c_background line which is activated when they' are executing an overlapped instruction. The overlapped instructions are "local DMA" instructions transferring data between the local memory interface and the peripheral interface.

The execution cycle for an overlapped local DMA instruction is slightly different from the execution cycle of other instructions. If an overlapped instruction is ITRV I I-IMXL 38 encountered for execution, the instruction controller 235 checks whether there is O already an overlapped instruction executing. If there is, or overlapping is disabled, the instruction controller 235 waits for that instruction to finish before proceeding with execution of that instruction. If there is not, and overlapping is enabled, the instruction controller 235 immediately decodes the overlapped instruction and configures the peripheral interface controller 237 and local memory controller 236 to carry out the instruction. After the register configuration is completed, the instruction controller 235 then goes on to update its registers (including finished register, status register.

instruction pointer, etc.) without waiting for the instruction to "complete" in the conventional sense. At this moment, if the finished sequence number equals the interrupt sequence number, 'the overlapped instruction completed' interrupt is primed rather than raising the interrupt immediately. The 'overlapped instruction completed' interrupt is raized when the overlapped instruction has fully completed.

Once the instruction has been decoded, the instruction controller attempts to prefetch the next instruction while the current instruction is executing. Most instructions take considerably longer to execute than they will to fetch and decode. The instruction controller 235 prefetches an instruction if all of the following conditions are met: 1. the currently executing instruction is not set to interrupt and pause; 2. the currently executing instruction is not a jump instruction; 3. the next instruction stream is prefetch-enabled; and 4. there is another instruction pending.

If the instruction controller 235 determines that prefetching is possible it requests the next instruction, places it in a prefetch buffer and then validates the buffer.

At this point there is nothing more for the instruction controller 235 to do until the currently executing instruction has completed. The instruction controller 235 determines the completion of an instruction by examining the c_active and cbackground lines associated with the CBus 231.

3.8 Update Registers of Instruction Controller Upon completion of an instruction, the instruction controller 235 updates its registers to reflect the new state. This must be done atomically to avoid problems with synchronising with possible external accesses. This atomic update process involves: 1. Obtaining the appropriate Register Access Semaphore. If the semaphore is taken by an agent external to the Instruction Controller 235, the instruction execution cycle waits at this point for the semaphore to be released before proceeding.

2. Updating the appropriate registers. The instruction pointer (ic_ipa or icipb) is incremented by the size of an instruction, unless the instruction was a IO:\CISRA\STAR\MASTER ]MSTRV I I-IMXL 39 successful jump, in which case the target value of the jump is loaded into the instruction pointer.

The finished register (ic_fna or ic_fnb). is then incremented if sequence numbering is enabled.

The status register (ic_stat) is also updated appropriately to reflect the new state. This includes setting the pause bits if necessary. The Instruction Controller 235 pauses if an interrupt has occurred and pausing is enabled for that interrupt or if any error has occurred. Pausing is implemented by setting the instruction stream pause bits in the status register (a_pause or b_pause bits in ic_stat). To resume instruction execution, these bits should be reset to 0.

3. Asserting a cend signal on the CBus 231 for one clock cycle, which indicates to other modules in the co-processor 224 that an instruction has been completed.

4. Raising an interrupt if required. An interrupt is raized if: a. "Sequence number completed" interrupt occurs. That is, if the finished register (ic_fna or ic_fnb) sequence number is the same as interrupt sequence number. Then this interrupt is primed, sequence numbering is enabled, and the interrupt occurs; or b. the just completed instruction was coded to interrupt on completion.

20 then this mechanism is enabled.

3.9 Semantics of the Register Access Semaphore The Register Access Semaphore is a mechanism that provides atomic accesses S"to multiple instruction controller registers. The registers that can require atomic access are as follows: 1. Instruction pointer register (ic_ipa and ic_ipb) S2. Todo registers (ic tda and ictdb) 3. Finished registers (icfna and icfnb) 4. Interrupt registers (icinta and icintb) The pause bits in the configuration register (ic_cfg) External agents can read all registers safely at any time. External agents are able to write any registers at any time. however to ensure that the Instruction Controller 235 does not update values in these registers, the external agent must first obtain the Register Access Semaphore. The Instruction Controller does not attempt to update any values in the abovementioned registers if the Register Access Semaphore is claimed externally. The instruction controller 235 updates all of the above mentioned registers in one clock cycle to ensure atomicity.

As mentioned above, unless the mechanism is disabled, each instruction has associated with it a 32 bit "sequence number". Instruction sequence numbers increment wrapping through from OxFFFFFFFF to 0x00000000.

I HNXL 40 When an external write is made into one of the Interrupt Registers (ic_inta or Sic_intb). the instruction controller 235 immediately makes the following comparisons and updates: 1. If the interrupt sequence number (ie. the value in the Interrupt Register) is "greater" (in a modulo sense) than the finished sequence number (ie. the value in the Finished Register) of the same stream, the instruction controller primes the "sequence number completed" interrupt mechanism by setting the "sequence number completed" primed bit (a_primed or b_primed bit in ic_stat) in the status register.

2. If the interrupt sequence 'number is not "greater" than the finished sequence number, but there is an overlapped instruction in progress in that stream and the interrupt sequence number equals the last overlapped instruction sequence number (ie. the value in the icloa or ic_lob register), then the instruction controller primes the "overlapped instruction sequence number completed" interrupt mechanism by setting the a_olprimed or b_ol_primed bits in the ic_stat register.

15 3. If the interrupt sequence number is not "greater" than the finished sequence number, and there is an overlapped instruction in progress in that stream, but the interrupt sequence number does not equal the last overlapped instruction sequence number, then the interrupt sequence number represents a finished instruction, and no interrupt mechanism is primed.

4. If the interrupt sequence number is not "greater" than the finished sequence number, and there is no overlapped instruction in progress in that stream, then the interrupt sequence number must represent a finished instruction, and no interrupt mechanism is primed.

External agents can set any of the interrupt primed bits (bits a_primed, aol_primed. b_primed or b_ol_primed) in the status register to activate or de-activate this interrupt mechanism independently.

3.10 Instruction Controller Turning now to Fig. 13, there is illustrated the instruction controller 235 in more detail. The instruction controller 235 includes an execution controller 305 which implements the instruction execution cycle as well as maintaining overall executive control of the co-processor 224. The functions of the execution controller 305 include maintaining overall executive control of the instruction controller 235, determining instructing sequencing, instigating instruction fetching and prefetching, initiating instructing decoding and updating the instruction controller registers. The instruction controller further includes an instruction decoder 306. The instruction decoder 306 accepts instructions from a prefetch buffer controller 307 and decodes them according the aforementioned description. The instruction decoder 306 is responsible for configuring registers in the other co-processor modules to execute the instruction. The prefetch buffer controller 307 manages the reading and writing to a prefetch buffer !0:\CISRA\STAR\ASTERIMSTRV II iMXL 41 within the prefetch buffer controller and manages the interfacing between the instruction decoder 306 and the input interface switch 252 (Fig. The prefetch buffer controller 307 is also responsible for managing the updating of the two instruction pointer registers (ic_ipa and ic_ipb). Access to the CBus 231 (Fig. 2) by the instruction controller 235, the miscellaneous module 239 (Fig. 2) and the external interface controller 238 (Fig. 2) is controlled by a "CBus" arbitrator 308 which arbitrates between the three modules' request for access. The requests are transferred by means of a control bus (CBus) 231 to the register units of the various modules.

Turning now to Fig. 14, there is illustrated the execution controller 305 of Fig.

13 in more detail. As noted previously, the execution controller is responsible for implementing the instruction execution cycle 275 of Fig. 9 and, in particular, is responsible for: 1. Determining which instruction stream the next instruction is to come from; 2. Initiating fetching of that instruction; 3. Signalling the instruction decoder to decode the instruction as residing in the prefetch buffer; 4. Determining and initiating any prefetching of the next instruction; 5. Determining instruction completion: and 6. Updating the registers after the instruction has completed.

The execution controller includes a large core state machine 310 hereinafter known as "the central brain" which-implements the overall instruction execution cycle.

Turning to Fig. 15, there is illustrated the state machine diagram for the central brain 310 implementing the instruction execution cycle as aforementioned. Returning to Fig.

14, the execution controller includes an instruction prefetch logic unit 311. This unit is responsible for determining whether there is an outstanding instruction to be executed and which instruction stream the instruction belongs to. The start 312 and prefetch 313 states of the transition diagram of Fig. 15 utilize this information in obtaining instructions. A register management unit 317 of Fig. 14 is responsible for monitoring the register access semaphores on both instruction streams and updating all necessary registers in each module. The register management unit 317 is also responsible for comparing the finished register (ic_fna or ic_fnb) with the interrupt register (ic_inta or icintb) to determine if a "sequence number completed" interrupt is due. The register management unit 317 is also responsible for interrupt priming. An overlapped 3- instructions unit 318 is responsible for managing the finishing off of an overlapped instruction through management of the appropriate status bits in the ic_stat register.

The execution controller also includes a decoder interface unit 319 for interfacing between the central brain 310 and the instruction decoder 306 of Fig. 13.

IO:\CISRA\STA R\MMASTERIMISTR\' I INIXL 42 Turning now to Fig. 16, there is illustrated the instruction decoder 306 in more Y detail. The instruction decoder is responsible for configuring the co-processor to execute the instructions residing in the prefetch buffer. The instruction decoder 306 includes an instruction decoder sequencer 321 which comprizes one large state machines broken down into many smaller state machines. The instruction sequencer 321 communicates with a CBus dispatcher 312 which is responsible for setting the registers within each module. The instruction decoder sequencer 321 also communicates relevant information to the execution controller such as instruction validity and instruction overlap conditions. The instruction validity check being to check that the instruction opcode is not one of the reserved opcodes.

Turning now to Fig. 17, there is illustrated, in more detail, the instruction dispatch sequencer 321 of Fig. 16. The instruction dispatch sequencer 321 includes a overall sequencing control state machine 324 and a series of per module configuration sequencer state machines, eg. 325, 326. One per module configuration sequencer state 15 machine is provided for each module to be configured. Collectively the state machines implement the co-processor's microprogramming of the modules. The state machines, eg. 325, instruct the CBus dispatcher to utilize the global CBus to set various registers so as to configure the various modules for processing. A side effect of writing to particular registers is that the instruction execution commences. Instruction execution 20 typically takes much longer than the time it takes for the sequencer 321 to configure the co-processor registers for execution. In appendix A, attached to the present specification, there is disclosed the microprogramming operations performed by the instruction sequencer of the co-processor in addition to the form of set up by the instruction sequencer 321.

In practice, the Instruction Decode Sequencer 321 does not configure all of the modules within the co-processor for every instruction. The table below shows the ordering of module configuration for each class of instruction with the module configured including the pixel organizer 246 the data cache controller 240 (DCC), the operand organizer B 247 (OOB), the operand organizer C 248 (OOC), main data path 242 (MDP), results organizer 249 and JPEG encoder 241 Some of the modules are never configured during the course of instruction decoding. These modules are the External Interface Controller 238 (EIC), the Local Memory Controller 236 (LMC). the Instruction Controller 235 itself the Input Interface Switch 252 (IIS) and the Miscellaneous Module (MM).

ASTER I MSTRV I IiMXL 43 9. 9 Table 5: Module Setup Order Instruction Module Configuration Sequence Class Sequence ID Compositing PO. DCC, OOB, OOC, MDP, RO 1 CSC PO. DCC, OOB, OOC, MDP, RO 2 JPEG coding PO, DCC, OOB, OOC, JC, RO 3 Data coding PO. DCC, OOB, OOC, JC, RO 3 Transformations and PO, DCC, OOB, OOC, MDP, RO 2 Convolutions Matrix Multiplication PO, DCC, OOB, OOC, MDP, RO 2 Halftoning PO, DCC, OOB, MDP, RO 4 General memory copy PO, JC, RO 8 Peripheral DMA PIC Hierarchial Image PO. DCC, OOB, OOC, MDP, RO 6 Horizontal Interpolation Hierarchial Image others PO. DCC, OOB, OOC, MDP, RO 4 Internal access RO. RO, RO, RO 7 others Turning now to Fig. 17. each of the module configuration sequencers, eg. 325 is responsible for carrying out the required register access operations to configure the particular module. The overall sequencing control state machine 324 is responsible for overall operation of the module configuration sequencer in the aforementioned order.

Referring now to Fig. 18. there is illustrated 330 the state transition diagram for the overall sequencing control unit which basically activates the relevant module configuration sequencer in accordance with the above table. Each of the modules configuration sequencers is responsible for controlling the CBus dispatcher to alter register details in order to set the various registers in operation of the modules.

Turning now to Fig. 19. there is illustrated the prefetch buffer controller 307 of Fig. 13 in more detail. The prefetch buffer controller consists of a prefetch buffer 335 for the storage of a single co-processor instruction (six times 32 bit words). The prefetch buffer includes one write port controlled by a IBus sequencer 336 and one read port which provides data to the instruction decoder, execution controller and the instruction controller CBus interface. The IBus sequencer 336 is responsible for observing bus protocols in the connection of the prefetch buffer 335 to the input interface switch. An address manager unit 337 is also provided which deals with address generation for instruction fetching. The address manager unit 337 performs the IO:\CI RA\STAR\MASTERIN ITRV I HtNL 44 functions of selecting one of ic_ipa or ic_ipb to place on the bus to the input interface switch, incrementing one of ic_ipa or ic_ipb based on which stream the last instructions was fetched from and channelling jump target addresses back to the icipa and ic ipb register. A PBC controller 339 maintains overall control of the prefetched buffer controller 307.

3.11 Description of a Modules Local Register File As illustrated in Fig. 13, each module, including the instruction controller module itself, has an internal set of registers 304 as previously defined in addition to a CBus interface controller 303 as illustrated in Fig. 20 and which is responsible for receiving CBus requests and updating internal registers in light of those requests. The module is controlled by writing registers 304 within the module via a CBus interface 302. A CBus arbitrator 308 (Fig. 13) is responsible for determining which module of the instruction controller 235, the external interface controller or the miscellaneous module is able to control the CBus 309 for acting as a master of the CBus and for the 15 writing or reading of registers.

'*Fig. 20, illustrates, in more detail, the standard structure of a CBus interface 303 as utilized by each of the modules. The standard CBus interface 303 accepts read ""and write requests from the CBus 302 and includes a register file 304 which is utilized 341 and updated on 341 by the various submodules within a module. Further, control 20 lines 344 are provided for the updating of any submodule memory areas including reading of the memory areas. The standard CBus interface 303 acts as a destination on the CBus, accepting read and write requests for the register 304 and memory objects inside other submodules.

A "creset" signal 345 sets every register inside the Standard CBus interface 25 103 to their default states. However, "c reset" will not reset the state machine that controls the handshaking of signals between itself and the CBus Master, so even if "c reset" is asserted in the middle of a CBus transaction, the transaction will still finish, with undefined effects. The "c_int" 347, "c_exp" 348 and "c_err" 349 signals are generated from the content of a modules err_int and err int en registers by the following equations: c err error[i] AND errmask[i] (1) errorI i not reserved c_ int interrupt[i] AND int_ mask[i] (2) interruptll inot reserved 1O:\CISRA\STAR\MASTERIMSTRVI IIMXL 45 c_ exp exception[i] AND exp_ mask[i] (3) [i not reserved The signals "c_sdata in" 345 and "c_svalid_in" are data and valid signals from the previous module in a daisy chain of modules. The signals "c sdata out" and "c_svalidout" 350 are data and valid signals going to the next module in the daisy chain.

The functionality of the Standard CBus interface 303 includes: 1. register read/write handling 2. memory area read/write handling 3. test mode read/write handling 4. submodule observe/update handling 3.12 Register Read/Write Handling The Standard CBus Interface 303 accepts register read/write and bit set 6* requests that appears on the CBus. There are two types of CBus instructions that 15 Standard CBus Interface handles: 1. Type A Type A operations allow other modules to read or write 1, 2, 3, or 4 bytes into any register inside Standard CBus Interface 303. For write operations, the data cycle occurs in the clock cycle immediately after the instruction cycle. Note that the type 20 field for register write and read are "1000" and "1001" respectively. The Standard CBus Interface 303 decodes the instruction to check whether the instruction is .J addressed to the module, and whether it is a read or write operation. For read operation, the Standard CBus Interface 303 uses the "reg" field of the CBus transaction to select which register output is to put into the "c_sdata" bus 350. For write 25 operations, the Standard CBus Interface 303 uses the "reg" and "byte" fields to write the data into the selected register. After read operation is completed, the Standard CBus Interface returns the data and asserts "c svalid" 350 at the same time. After write operations are completed, the Standard CBus Interface 303 asserts "c_svalid" 350 to acknowledge.

2. Type C Type C operations allow other modules to write one or more bits in one of the bytes in one of the registers. Instruction and data are packed into one word.

The Standard CBus Interface 303 decodes the instruction to check whether the instruction is addressed to the module. It also decodes "reg", "byte" and "enable" fields to generate the required enable signals. It also latches the data field of the instruction, and distributes it to all four bytes of a word so the required bit(s) are written in every enabled bit(s) in every enabled byte(s). No acknowledgment is required for this operation.

[O:\CISRA\STARNIASTIERINSTRVI IIMXL 46 3.13 Memory Area Read/Write Handling The Standard CBus Interface 303 accepts memory read and memory write requests that appears on the CBus. While accepting a memory read/write request, the Standard CBus Interface 303 checks whether the request is addressed to the module.

Then, by decoding the address field in the instruction, the Standard CBus Interface generates the appropriate address and address strobe signals 344 to the submodule which a memory read/write operation is addressed to. For write operations the Standard CBus Interface also passes on the byte enable signals from the instruction to the submodules.

The operation of the standard CBus interface 303 is controlled by a read/write controller 352 which decodes the type field of a CBus instruction from the CBus 302 and generates the appropriate enable signals to the register file 304 and output selector 353 so that the data is latched on the next cycle into the register file 304 or forwarded to other submodules 344. If the CBus instruction is a register read operation, the read/write controller 352 enables the output selector 353 to select the correct register output going onto the "csdata bus" 345. If the instruction is a register write operation, the read/write controller 352 enables the register file 304 to select the data in the next ooooo cycle. If the instruction is a memory area read or write, then the read/write controller 352 generates the appropriate signals 344 to control those memory areas under a modules control. The register file 304 contains four parts, being a register select decoder 355. an output selector 353, interrupt 356, error 357 and exception 358 generators, unmasked error generator 359 and the register components 360 which make up the registers of that particular module. The register select decoder 355 decodes the signal "refen" (register file enable), "write" and "reg" from the read/write controller 352 and generates the register enable signals for enabling the particular register of interest. The output selector 353 selects the correct register data to be output on c_sdata_out lines 350 for register read operations according to the signal "reg" output from the read/write controller 352.

The exception generators 356-359 generate an output error signal, eg. 347- 349. 362 when an error is detected on their inputs. The formula for calculating each output error is as aforementioned.

The register components 360 can be defined to be of a number of types in accordance with requirements as previously discussed when describing the structure of the register set with reference to Table 3.14 CBus Structure As noted previously, the CBus (control bus) is responsible for the overall control of each module by way transferring information for the setting of registers within each module's standard CBus interface. It will be evident from the description of the standard CBus interface that the CBus serves two main purposes: [O:\CISRA\STAR\N1AS-TERjMSTRV II I MXL 47 1. It is the control bus that drives each of the modules.

2. It is the access bus for RAMs, FIFOs and status information contained within each of the modules.

The CBus uses an instruction-address-data protocol to control modules by the setting configuration registers within the modules. In general, registers will be set on a per instruction basis but can be modified at any time. The CBus gathers status and other information, and accesses RAM and FIFO data from the various modules by requesting data.

The CBus is driven on a transaction by transaction basis either by: 1. the Instruction Controller 235 (Fig. 2) when executing instructions, 2. the External Interface Controller 238 (Fig. 2) when performing a target (slave) mode bus operation, or 3. an external device if the External CBus Interface is so configured.

In each of these cases, the driving module is considered to be the source module of the CBus, and all other modules possible destinations. Arbitration on this bus is carried out by the Instruction Controller.

The following table sets out one form of CBus signal definitions suitable for use with the preferred embodiment: Table 6: CBus Signal Definition Name Type Definition c_iad[31:0] source instruction-address-data c valid source CBus instruction valid c_sdata[31:0] destination status/read data c svalid destination status/read data valid c_reset[15:0] source reset lines to each module c_active[15:0] destination active lines from each module c_background[15:0] destination background active lines from each module c_int[15:0] destination interrupt lines from each module c_error[15:0] destination error lines from each module c_reql, c_req2 EIC, external bus control request [O:\CISRA\STAR\MASTERIMSTR VI 1NIXL 48 Name Type Definition c_gntl, c_gnt2 IC bus control grant c end IC end of instruction clk global clock A CBus c_iad signal contains the addressing data and is driven by the controller in two distinct cycles: 1. Instruction cycles (c_valid high) where the CBus instruction and an address is driven onto c_iad; and 2. Data cycles (c_valid low) where data is driven onto c_iad (write operations) or c_sdata (read operations).

In the case of a write operation, the data associated with an instruction is placed on the ciad bus in the cycle directly following the instruction cycle. In the case of a read operation, the target module of the read operation drives the c_sdata signal until the data cycle completes.

Turning now to Fig. 21, the bus includes a 32 bit instruction-address-data field which can be one of three types 370-372: 1. Type A operations (370) are used to read and write registers and the per-module data areas within the co-processor. These operations can be generated by the external interface controller 238 performing target mode PCI cycles, by the instruction controller 231 configuring the co-processor for an instruction, and by the External CBus Interface.

For these operations, the data cycle occurs in the clock cycle immediately following the instruction cycle. The data cycle is acknowledged by the designation module using the c_svalid signal.

2. Type B operations (371) are used for diagnostic purposes to access any local memory and to generate cycles on the Generic Interface. These operations will be generated by the External Interface Controller performing target mode PCI cycles and by the External CBus Interface. The data cycle can follow at any time after the instruction cycle. The data cycle is acknowledged by the destination module using the csvalid signal.

3. Type C operations (372) are used to set individual bits within a module's registers. These operations will be generated by the instruction controller 231 configuring the co-processor's for an instruction and by the External CBus Interface.

There is no data cycle associated with a Type C operation, data is encoded in the instruction cycle.

[O:\CISRA\STAR\MASTERI\MSTRV I HMXL 49 The type field of each instruction encodes the relevant accordance with the following table: CBus transaction type in Table 7: CBus Transaction Types c_iad.type transaction type instruction value format type 0000 no-op A, B, C 0001 reserved 0010 peripheral interface write B 0011 peripheral interface read B 0100 generic bus write B 0101 generic bus read B 0110 local memory write B 0111 local memory read B 1000 register write A 1001 register read A 1010 module memory write A 1011 module memory read A 1100 test mode write A 1101 test mode read A 1110 bit set C 1111 reserved The byte field is utilized for enabling bits within a register to be set. The module field sets out the particular module to which an instruction on the CBus is addressed. The register field sets out which of the registers within a module is to be updated. The address field is utilized for addressing memory portions where an operation is desired on those memory portions and can be utilized for addressing RAMs, FIFOs, etc. The enable field enables selected bits within a selected byte when a bit set instruction is utilized. The data field contains the bit wize data of the bits to be written to the byte selected for update.

As noted previously, the CBus includes a cactive line for each module, which is asserted when ever a module has outstanding activity pending. The instruction controller utilizes these signals to determine when an instruction has completed.

Further. the CBus contains a c_background line for each module that can operate in a background mode in addition to any preset. error and interrupt lines, one for each module, for resetting, detecting errors and interrupts.

[O\CISRAX\S'TAR\NIASTERI MSTR\ I I NXL 50 3.15 Co-processor Data Types and Data Manipulation O Returning now to Fig. 2. in order to substantially simplify the operation of the co-processor unit 224, and in particular the operation of the major computational units within the co-processor being the JPEG coder 241 and the main data path 242, the coprocessor utilizes a data model that differentiates between external formats and internal formats. The external data formats are the formats of data as it appears on the coprocessor's external interfaces such as the local memory interface or the PCI bus.

Conversely, the internal data formats are the formats which appear between the main functional modules of the co-processor 224. This is illustrated schematically in Fig. 22 which shows the various input and output formats. The input external format 381 is the format which is input to the pixel organizer 246, the operand organizer B 247 and the operand organizer C 248. These organizers are responsible for reformatting the input external format data into any of a number of input internal formats 382, which may be .e inputted to the JPEG coder unit 241 and the main data path unit 242. These two functional units output data in any of a number of output internal formats 383, which are converted by the results organizer 249 to any of a number of required output formats 304.

S"In the embodiment shown, the external data formats can be divided into three types. The first type is a "packed stream" of data which consists of a contiguous stream of data having up to four channels per data quantum, with each channel consisting of one, two, four, eight or sixteen bit samples. This packed stream can typically represent pixels, data to be turned into pixels. or a stream of packed bits. The co-processor is designed to utilize little endian byte addressing and big endian bit addressing within a byte. In Fig. 23, there is illustrated a first example 386 of the packed stream format. It is assumed that each object 387 is made up of three channels being channel 0, channel 1 and channel 2, with two bits per channel. The layout of data for this format is as indicated 388. In a next example 390 of Fig. 24, a four channel object 395 having eight bits per channel is illustrated 396 with each data object taking up a 32 bit word. In a third example 395 of Fig. 25, one channel objects 396 are illustrated which each take up eight bits per channel starting at a bit address 397.

Naturally, the actual width and number of channels of data will vary depending upon the particular application involved.

A second type of external data format is the "unpacked byte stream" which consists of a sequence of 32 bit words, exactly one byte within each word being valid.

An example of this format is shown in Fig. 26 and designated 399. in which a single byte 400 is utilized within each word.

A further external data format is represented by the objects classified as an "other" format. Typically, these data objects are large table-type data representing information such as colour space conversion tables, Huffman coding tables and the like.

[O:\CIS R\STA R\N I ASTERIM STRV I II AXL -51 The co-processor utilizes four different internal data types. A first type is known as a "packed bytes" format which comprizes 32 bit words, each consisting of four active bytes, except perhaps for a final 32 bit word. In Fig. 27, there is illustrated one particular example 402 of the packed byte format with 4 bytes per word.

The next data type, illustrated with reference to Fig. 28, is "pixel" format and comprises 32 bit words 403, consisting of four active byte channels. This pixel format is interpreted as four channel data.

A next internal data type illustrated with reference to Fig. 29 is an "unpacked byte" format, in which each word consists of one active byte channel 405 and three inactive byte channels, the active byte channel being the least significant byte.

All other internal data objects are classified by the "other" data format.

Input data in a given external format is converted to the appropriate internal format. Fig. 30 illustrates the possible conversions carried out by the various organizers from an external format 410 to an internal format 411. Similarly, Fig. 31 illustrates the conversions carried out by the results organizer 249 in the conversion from internal formats 412 to external formats 413.

The circuitry to enable the following conversions to take place are described in greater detail below.

Turning firstly to the conversion of input data external formats to internal formats, in Fig. 32 there is shown the methodology utilized by the various organizers in the conversion process. Starting initially with the external other format 416, this is merely passed through the various organizers unchanged. Next, the external unpacked byte format 417 undergoes unpacked normalization 418 to produce a format 419 known as internally unpacked bytes. The process of unpacked normalization 418 involves 25 discarding the three inactive bytes from an externally unpacked byte stream. The process of unpacked normalization is illustrated in Fig. 33 wherein the input data 417 having four byte channels wherein only one byte channel is valid results in the output format 419 which merely comprizes the bytes themselves.

Turning again to Fig. 32, the process of packed normalization 421 involves translating each component object in an externally packed stream 422 into a byte stream 423. If each component of a channel is less than a byte in size then the samples are interpolated up to eight bit values. For example, when translating four bit quantities to byte quantities, the four bit quantity OxN is translated to the byte value OxNN. Objects larger than one byte are truncated. The input object sizes supported on the stream 422 are 1, 2. 4. 8 and 16 bit sizes, although again these may be different depending upon the total width of the data objects and words in any particular system to which the invention is applied.

Turning now to Fig. 34, there is illustrated one form of packed normalization 421 on input data 422 which is in the form of 3 channel objects with two bits per [O:\CISR.A\STAR\NIASTERJMSTRV I IIMXL 52 channel (as per the data format 386 of Fig. 23). The output data comprizes a byte channel format 423 with each channel "interpolated up" where necessary to comprize an eight bit sample.

Returning to Fig. 32, the pixel streams are then subjected to either a pack operation 425, an unpacked operation 426 or a component selection operation 427.

In Fig. 35 there is shown an example of the packed operation 425 which simply involves discarding the inactive byte channel and producing a byte stream.

packed up with four active bytes per word. Hence. a single valid byte stream 430 is compressed into a format 431 having four active bytes per word. The unpacking operation 426 involves almost the reverse of the packing operation with the unpacked bytes being placed in the least significant byte of a word. This is illustrated in Fig. 36 wherein a packed byte stream 433 is unpacked to produce result 434.

The process of component selection 427 is illustrated in Fig. 37 and involves *oo.

selecting N components from an input stream, where N is the number of input channels •I '15 per quantum. The unpacking process can be utilized to produce "prototype pixels" eg.

437, with the pixel channels filled from the least significant byte. Turning to Fig. 38, there is illustrated an example of component selection 440 wherein input data in the .o.oi form 436 is transformed by the component selection unit 427 to produce prototype pixel format 437.

20 After component selection, a process of component substitution 440 (Fig. 32) •oo can be utilized. The component substitution process 440 is illustrated in Fig. 38 and comprizes replacing selected components with a constant data value stored within an internal data register 441 to produce, as an example, output components 242.

Returning again to Fig. 32, the output of stages 425, 426 and 440 is subjected to a lane swapping process 444. The lane swapping process, as illustrated in Fig. 39.

involves a byte-wize multiplexing of any lane to any other lane, including the replication of a first lane onto a second lane. The particular example illustrated in Fig. 39 includes the replacement of channel 3 with channel 1 and the replication of channel 3 to channels 2 and channel 1.

Returning again to Fig. 32, after the lane swapping step 444 the data stream can be optionally stored in the multi-used value RAM 250 before being read back and subjected to a replication process 446.

The replication process 446 simply replicates the data object whatever it may be. In Fig. 40, there is illustrated a process of replication 446 as applied to pixel data.

In this case, the replication factor is one.

In Fig. 41, there is illustrated a similar example of the process of replication applied to packed byte data.

In Fig. 42, there is illustrated the process utilized by the result organizer 249 for transferral of data in an output internal format 383 to an output external format 384.

[O:\CSRA\.STAR\IASTERIMSTRV I IIMXL 53 This process includes equivalent steps 424, 425, 426 and 440 to the conversion process described in Fig. 32. Additionally, the process 450 includes the steps of component deselection 451, denormalization 452, byte addressing 453 and write masking 454. The component deselection process 451, as illustrated in Fig. 43, is basically the inverse operation of the component selection process 427 of Fig. 37 and involves the discarding of unwanted data. For example, in Fig. 43, only 3 valid channels of the input are taken and packed into data items 456.

The denormalization process 452 is illustrated with reference to Fig. 44 and is loosely the inverse operation of the packed normalization process 421 of Fig. 34. The denormalization process involves the translation of each object or data item, previously treated as a byte, to a non-byte value.

The byte addressing process 453 of Fig. 42 deals with any byte wize reorganization that is necessary to deal with byte addressing issues. For an externally unpacked byte output stream, the least two significant bits of the stream's address correspond to the active stream. The byte addressing step 453 is responsible for remapping the output stream from one byte channel to another when external unpacked bytes are utilized (Fig. 45). Where an externally packed stream is utilized (Fig. 46), the byte addressing module 453 remaps the start address of the output stream as illustrated.

o*o.

The write masks process 454 of Fig. 42 is illustrated in Fig. 47 and is used to mask off a particular channel eg. 460 of a packed stream which is not to be written out.

The details of the input and output data type conversion to be applied are specified by the contents of the corresponding Data Manipulation Registers: The Pixel Organizer Data Manipulation Register (podmr) The Operand Organizer B and Operand Organizer C Data S"Manipulation Registers (oob_dmr, ooc_dmr); S The Result Organizer Data Manipulation Register (ro_dmr); Each of the Data Manipulation Registers can be set up for an instruction in one of two ways: 1. They can be explicitly set using any of the standard methods for writing to the co-processor's registers immediately prior to the execution of the instruction: or 2. They can be set up by the co-processor itself to reflect a current instruction.

During the instruction decoding process, the co-processor examines the contents of the Instruction Word and the Data Word of the instruction to determine, amongst other things, how to set up the various Data Manipulation Registers. Not all combinations of the instruction and operands make sense. Several instructions have implied formats for some operands. Instructions that are coded with inconsistent [O:\CISRA\STAR\VASTERJMSTRV I IIMXL 54

S.

*SSS

S.

S.

S.

*SSS

operands may complete without error, although any data so generated is "undefined".

If the bit of the corresponding Data Descriptor is 0. the co-processor sets the Data Manipulation Register to reflect the current instruction.

The format of the Data Manipulation Registers is illustrated in Fig. 48. The following table sets out the format of the various bits within the registers as illustrated in Fig. 48: Table 8: Data Manipulation Register Format Field Description ls3 Lane Swap for byte 3 (most significant byte) ls2 Lane swap for byte 2 Isl Lane swap for byte 1 IsO Lane swap for byte 0 suben Substitution Enables 1 substitute data from Internal Data Register for this byte 0 do not substitute data from Internal Data Register for this byte replicate Replication Count Indicates the number of additional data items to generate.

wrmask Write Masks 0 write out corresponding byte channel 1 do not write out corresponding byte channel cmsb Choose most significant bits 0 choose least significant bits of a byte when performing denormalization (useful for halftoning operations) 1 choose most significant bits of a byte when performing denormalization (useful as inverse of input normalization) IO:\CISRA\STAR\X:XST:R INISTR\ I I 55

I

Field Description 0* 0 S 0* t S normalize Normalization factor: represents the number of bits to be translated to a byte: 0 1 bit data objects 1 2 bit data objects 2 4 bit data objects 3 8 bit data objects 4 16 bit data objects bo Bit Offset: represents the starting bit address for objects smaller than a byte. Bit addressing is big endian.

P External Format: 0 unpacked bytes 1 packed stream if Internal Format: 0 pixels 1 unpacked bytes 2 packed bytes 3 other cc Channel count: For the Input Organizers this defines the number of normalized input bytes collected to form each internal data word during component selection. For the Output Organizer this defines the number of valid bytes from the internal data word that will be sued to construct output data.

0 4 active channels 1 1 active channels 2 2 active channels 3 3 active channels L Immediate data: 0 not long: immediate data 1 long: pointer to data *0 5 S S4 a IO:\CISRA\STAR\MATER I ISTRV II IMXL 56 Field Description what addressing mode: 0 instruction specific mode 1 sequential addressing 2 tile addressing 3 constant data. ie, one item of internal data is produced, and this item is used repetitively.

A plurality of internal and external data types may be utilized with each instruction. All operand, results and instruction type combinations are potentially valid, although typically only a subset of those combinations will lead to meaningful results. Particular operand and result data types that are expected for each instruction are detailed below in a first table (Table 9) summarising the expected data types for external and internal formats: 0 Table 9: Expected Data Types Instruction Operand A Operand B Operand C Result (Pixel (Operand (Operand (Result Organizer) Organizer B) Organizer C) Organizer) Compositing ps px ps px(T) ps ub px ps bl(B) ub ub ub const GCSC ps ift mcsc mcs ms mcsc mcsc ift scsc scsc scsc scsc

(B)

JPEG comp. ps pb et et et et ub ps us (B) JPEG decomp ps pb fdt fdt fdt fdt pb ps sdt sdt sdt sdt ub

(B)

Data coding ps px et et et et px ps ub pb fdt fdt fdt fdt pb ub ub sdt sdt sdt sdt ub

(B)

Transformations skd skd it it it it px ps and Convolutions Ikd Ikd ub Matrix ps px mm mm mm mm(B px ps Multiplication ub ub IO:\CISRA\S'rAR\NIASTERjMMSIRV I 101XIL 57 Instruction Operand A Operand B Operand C Result (Pixel (Operand (Operand (Result Organizer) Organizer B) Organizer C) Organizer) Halftoning ps px ps px px ps ub pb ub pb pb ub ub ub ub Hierarchial Image: ps px px ps horizontal ub pb pb ub interpolation ub ub Hierarchial Image: ps px ps px px ps vertical interpolation ub pb ub pb pb ub and residual merging ub ub ub General Memory ps px px ps Copy ub pb pb ub ub Peripheral DMA Internal Access Flow Control The symbols utilized in the above table are as follows: Table 10: Symbol Explanation Symbol Explanation ps packed stream pb packed bytes ub unpacked bytes px pixels bl blend const constant mcsc 4 output channel scsc 1 output channel color conversion table ift Interval and Fraction tables et JPEG encoding table fdt fast JPEG decoding table sdt slow JPEG decoding table skd short kernel descriptor Ikd long kernel descriptor mm matrix co-efficient table fO:\CISRA\STAR\MASTERjMSTRV I I-1MXL_ 58 Symbol Explanation it image table this organizer in bypass mode for this operation operand may tile no data flows via this operand 3.16 Data Normalization Circuit Referring to Fig. 49, there is shown a computer graphics processor having three main functional blocks: a data normalizer 1062 which may be implemented in each of the pixel organizer 246 and operand organizers B and C 247, 248, a central graphics engine in the form of the main data path 242 or JPEG units 241 and a programming agent 1064, in the form of an instruction controller 235. The operation of the data normalizer 1062 and the central graphics engine 1064 is determined by an 10 instruction stream 1066 that is provided to the programming agent 1064. For each instruction, the programming agent 1064 performs a decoding function and outputs internal control signals 1067 and 1068 to the other blocks in the system. For each input data word 1069, the normalizer 1062 will format the data according to the current instruction and pass the result to the central graphics engine 1063, where further 15 processing is performed.

The data normalizer represents, in a simplified form, the pixel organizer and the operand organizers B and C. Each of these organizers implements the data ~normalization circuitry, thereby enabling appropriate normalization of the input data prior to it passing to the central graphics engine in the form of the JPEG coder or the main data path.

The central graphics engine 1063 operates on data that is in a standard format, which in this case is 32-bit pixels. The normalizer is thus responsible for converting its input data to a 32-bit pixel format. The input data words 1069 to the normalizer are also 32 bits wide, but may take the form of either packed components or unpacked bytes. A packed component input stream consists of consecutive data objects within a data word, the data objects being 1,2,4,8 or 16 bits wide. By contrast, an unpacked byte input stream consists of 32-bit words of which only one 8-bit byte is valid.

Furthermore, the pixel data 11 produced by the normalizer may consist of 1,2,3 or 4 valid channels, where a channel is defined as being 8 bits wide.

Turning now to Fig. 50, there is illustrated in greater detail a particular hardware implementation of the data normalizer 1062. The data normalization unit 1062 is composed of the following circuits: a First-In-First-Out buffer (FIFO) 1073, a 32-bit input register (REGl) 1074, a 32-bit output register (REG2) 1076, normalization [O:\CISRAI\STAR\NIASTERINiSTRV I I-IfXL 59 multiplexors 1075 and a control unit 1076. Each input data word 1069 is stored in the FIFO 1073 and is subsequently latched into REGI 1074. where it remains until all its input bits have been converted into the desired output format. The normalization multiplexors 1075 consist of 32 combinatorial switches that produce pixels to be latched into REG2 by selecting bits from the value in REG1 1074 and the current output of the FIFO 1073. Thus the normalization multiplexors 1075 receive two 32-bit input words 1077, 1078, denoted as x[63..32] and x[31..0].

It has been found that such a method improves the overall throughput of the apparatus. especially when the FIFO contains at least two valid data words during the course of an instruction. This is typically due to the way in which data words originally fetched from memory. In some cases, a desired data word or object may be spread across or "wrapped" into a pair of adjacent input data words in the FIFO buffer.

By using an additional input register 1074, the normalization multiplexers can reassemble a complete input data word using components from adjacent data words in 15 the FIFO buffer, thereby avoiding need for additional storage or bit-stripping operations prior to the main data manipulation stages. This arrangement is particularly advantageous where multiple data words of a similar type are inputted to the normalizer.

The control unit generates enable signals REGI_EN 20 and REG2_EN[3..0] 20 1081 for updating REG1 1074 and REG2 1076. respectively, as well as signals to control the FIFO 1073 and normalization multiplexors 1075.

The programming agent 1064 in Fig. 49 provides the following configuration signals for the data normalizer 1062: a FIFO_WR 4 signal. a normalization factor a bit offset a channel count and an external format Input data is written into the FIFO 1073 by asserting the FIFOWR signal 1085 for each clock cycle that valid data is present. The FIFO asserts a fifo_full status flag 1086 when there is no space available. Given 32-bit input data, the external format signal is used to determine whether the input is in the format of a packed stream (when E= 1) or consists of unpacked bytes (when For the case when E=I, the normalization factor encodes the size of each component of a packed stream, namely: n=O denotes 1bit wide components, n=l denotes 2 bits per component, n=2 denotes 4 bits per component, n=3 denotes 8-bit wide components and n>3 denotes 16-bit wide components. The channel count encodes the maximum number of consecutive input objects to format per clock cycle in order to produce pixels with the desired number of valid bytes. In particular, c= 1 yields pixels with only the least significant byte valid.

c=2 denotes least significant 2 bytes valid, c=3 denotes least significant 3 bytes valid and c=0 denotes all 4 bytes valid.

When a packed stream consists of components that are less than 8 bits wide.

the bit offset determines the position in the value stored in REG1, from which IO:\CISRA\SrTAR\NIAS-IEiITR\'III I XL 60 to begin processing data. Assuming a bit offset relative to the most significant bit of the first input byte, the method for producing an output data byte y[ 7 0] is described by the following set of equations where n 0: y[i] where 0 i 7 where n 1 y[i] where i 1,3,5,7 y[i] where i 0,2.4,6 where n 2 y[3] x[7-b] y[2] x[6-b] 15 y[l] y[0] x[4-b] y[7] y[ 3 y[6] y[2] y[l] 20 y[ 4 y[0] where n 3 y[i] where 0 i 7 where n 3: x[15..8] Corresponding equations may be used to generate output data bytes y[15..8].

y[23..16] and y[31..24].

The above method may be generalized to produce an output array of any length by taking each component of the input stream and replicating it as many times as necessary to generate output objects of standard width. In addition, the order of processing each input component may be defined as little-endian or big-endian. The above example deals with big-endian component ordering since processing always begins from the most significant bit of an input byte. Little-endian ordering requires redefinition of the bit offset to be relative to the least significant bit of an input byte. In situations where the input component width exceeds the standard output width, output components are generated by truncating each input component, typically by removing a suitable number of the least significant bits. In the above set of equations, truncation of 1O:\CISR\STAR\MASTERIMSTRV I I-1NXL 61 16-bit input components to form 8-bit wide standard output is performed by selecting the most significant byte of each 16-bit data object.

The control unit of Fig. 50 performs the decoding of and and uses the result along with and E to provide the select signals for the normalization multiplexors and the enable signals for REG1 and REG2. Since the FIFO may become empty during the course of an instruction, the control unit also contains counters that record the current bit position. in_bit[4..0], in REG1 from which to select input data, and the current byte. out_byie[1..0], in REG2 to begin writing output data. The control unit detects when it has completed processing each input word by comparing the value of in_bit[4..0] to the position of the final object in REG1. and initiates a FIFO read operation by asserting the FIFO_RD signal for one clock cycle when the FIFO is not empty. The signals fifo_empty and fifo_full denote the FIFO status flags, such that fifo_empty=l when the FIFO contains no valid data. and fifo_full= when the FIFO is full. In the same clock cycle that FIFO_RD is asserted, 15 REGI_EN is asserted so that new data are captured into REG1. There are 4 enable signals for REG2, one for each byte in the output register. The control unit calculates REG2_EN[3..0] by taking the minimum of the following 3 values the decoded version of the number of valid components remaining to be processed in REG1, and the number of unused channels in REG2. When E=0 there is only one valid component in REGI. A complete output word is available when the number of channels that have been filled in REG2 is equal to the decoded versior of In a particularly preferred embodiment of the invention, the circuit area occupied by the apparatus in Fig. 50 can be substantially reduced by applying a .q truncation function to the bit offset parameter. such that only a restricted set of offsets are used by the control unit and normalization multiplexors. The offset truncation depends upon the normalization factor and operates according to the following equation: 0. where n 3 where n 0 where n 1 b[2] where n 2 (Note that denotes bitwize concatenation).

The above method allows each of the normalization multiplexors, denoted in Fig. 50 by MUXO, MUX1 MUX31. to be reduced from 32-to-1 in size when no truncation is applied, to be a maximum size of 20-to-1 with bit offset truncation. The size reduction in turn leads to an improvement in circuit speed.

It can be seen from the foregoing that the preferred embodiment provides an efficient circuit for the transformation of data into one of a few normalized forms.

I WX- 62 3.17 Image Processing Operations of Accelerator Card Returning again to Fig. 2 and Table 2. as noted previously, the instruction controller 235 "executes" instructions which result in actions being performed by the co-processor 224. The instructions executed include a number of instructions for the performance of useful functions by the main data path unit 242. A first of these useful instructions is compositing.

3.17.1 Compositing Referring now to Fig. 51, there is illustrated the compositing model implemented by the main data path unit 242. The compositing model 462 generally has three input sources of data and the output data or sink 463. The input sources can firstly include pixel data 464 from the same destination within the memory as the output 463 is to be written to. The instruction operands 465 can be utilized as a data source which includes the color and opacity information. The color and opacity can be either flat, a blend, pixels or tiled. The flat or blend is generated by the blend generator 467, 15 as it is quicker to generate them internally than to fetch via input/output. Additionally, the input data can include attenuation data 466 which attenuates the operand data 465.

The attenuation can be flat, bit map or a byte map.

As noted previously, pixel data normally consists of four channels with each channel being one byte wide. The opacity channel is considered to be the byte of 20 highest address. For an introduction to the operation and usefulness of compositing operations, reference is made to the standard texts including the seminal paper by Thomas Porter and Tom Duff "Compositing Digital Images" in Computer Graphics, Volume 18, Number 3, July 1984.

The co-processor can utilize pre-multiplied data. Pre-multiplication can consist of pre-multiplying each of the colored channels by the opacity channel. Hence, two optional pre-multiplication units 468, 469 are provided for pre-multiplying the opacity channel 470, 471 by the colored data to form, where required, pre-multiplied outputs 472, 473. A compositing unit 475 implements a composite of its two inputs in accordance with the current instruction data. The compositing operators are illustrated in Table 11 below: Table 11: Compositing Operations Operator Definition (aco,ao) over (bco,bo) (ao +bco(1-ao),ao+bo(1-ao)) (aco,ao) in (bco,bo) (acoBo.aobo) (acoao) out (bcobo) (aco( -bo),ao(l-bo)) (aco atop (bco ,b o (acobo+bco( -ao),b) [O:\CISRA\STAR\MATER IMTRV I HMXL 63 Operator Definition (aco.ao) xor (bco,bo) (aco( 1-b o +bco(1-a o ),a o 1-bo) +b o (1ao)) (aco.ao) plus (bco,bo) (wc(aco+bco-r(ao+bo- 255)/255)+r(clamp(ao+bo)- 255)/255,clamp(ao b)) (aco,ao) loadzero (bco,bo) (0,0) (aco,a o loadc (bco,bo) (bco.a o (aco,ao) loado (bco,bo) (aco.b o (aco,ao) loadco (bco,bo) (bco.bo) The nomenclature (aco, a o refers to a pre-multiplied pixel of color a c and opacity a o R is an offset value and "wc" is a wrapping/clamping operator whose operation is explained below. It should be noted that the reverse operation of each 5 operator in the above table is also implemented by a composting unit 475.

A clamp/wrapping unit 476 is provided to clamp or wrap data around the limit values 0-255. Further, the data can be subjected to an optional "unpre-multiplication" 477 restoring the original pixel values as required. Finally, output data 463 is produced for return to the memory.

10 In Fig. 52, there is illustrated the form of an instruction word directed to the main data path unit for composting operations. When the X field in the major op-code is 1. this indicates a plus operator is to be applied in accordance with the aforementioned table. When this field is 0, another instruction apart from the plus operator is to be applied. The Pa field determines whether or not to pre-multiply the 15 first data stream 464 (Fig. 51). The Pb field determines whether or not to pre-multiply the second data stream 465. The Pr field determines whether or not to "unpremultiply" the result utilising unit 477. The C field determines whether to wrap or clamp, overflow or underflow in the range 0-255. The "com-code" field determines which operator is to be applied. The plus operator optionally utilizes an offset register (mdppor). This offset is subtracted from the result of the plus operation before wrapping or clamping is applied. For plus operators, the com-code field is interpreted as a per channel enablement of the offset register.

The standard instruction word encoding 280 of Fig. 10 previously discussed is altered for composting operands. As the output data destination is the same as the source, operand A will always be the same operand as the result word so operand A can be utilized in conjunction with operand B to describe at greater length the operand B. As with other instructions, the A descriptor within the instructions still describes the format of the input and the R descriptor defines the format of the output.

ASTERI NISTRV I HMXL -64- Turning now to Fig. 53, there is illustrated in a first example 470, the 0 instruction word format of a blend instruction. A blend is defined to have a start 471 and end value 472 for each channel. Similarly, in Fig. 54 there is illustrated 475 the format of a tile instruction which is defined by a tile address 476 a start offset 477, a length 478. All tile addresses and dimensions are specified in bytes. Tiling is applied in a modular fashion and, in Fig. 55, there is shown the interpretation of the fields 476 478 of Fig. 54. The tile address 476 denotes the start address in memory of the tile.

A tile start offset 477 designates the first byte to be utilized as a start of the tile. The tile length 478 designates the total length of the tile for wrap around.

Returning to Fig. 51, every color component and opacity can be attenuated by an attenuation value 466. The attenuation value can be supplied in one of three ways: 1. Software can specify a flat attenuation by placing the attenuation factor in the operand C word of the instruction.

2. A bit map attenuation where 1 means fully on and 0 means fully off can be utilized with software specifying the address of the bit map in the operand C word of the instruction.

3. Alternatively, a byte map attenuation can be provided again with the address of the byte map in operand C.

Since the attenuation is interpreted as an unsigned integer from 0-255, the premultiplied color channel is multiplied by the attenuation factor by effectively calculating: Coa Coa x A/255 Where A is the attenuation and C O is the pre-multiplied color channel.

3.17.2 Color Space Conversion Instructions Returning again to Fig. 2 and Table 2, the main data path unit 242 and data cache 230 are also primarily responsible for color conversion. The color space conversion involves the conversion of a pixel stream in a first color space format, for example suitable for RGB color display, to a second color space format, for example suitable for CYM or CYMK printing. The color space conversion is designed to work for all color spaces and can be used for any function from at least one to one or more dimensions.

The instruction controller 235 configures, via the Cbus 231, the main data path unit 242. the data cache controller 240, the input interface switch 252, the pixel organizer 246, the MUV buffer 250, the operand organizer B 247, the operand organizer C 248 and the result organizer 249 to operate in the color conversion mode.

In this mode, an input image consisting of a plurality of lines of pixels is supplied, one line of pixels after another, to the main data path unit 242 as a stream of pixels. The main data path unit 242 (Fig. 2) receives the stream of pixels from the input interface switch 252 via the pixel organizer 246 for color space conversion processing one pixel IOACISRA\STAR\WASTER]MSTRVI 4hMXL 65 at a time. In addition, interval and fractional tables are pre-loaded into the MUV buffer 0 250 and color conversion tables are loaded into the data cache 230. The main data path unit 242 accesses these tables via the operand organizers B and C, and converts these pixels, for example from the RGB color space to the CYM or CYMK color space and supplies the converted pixels to the result organizer 249. The main data path unit 242.

the data cache 230, the data controller 240 and the other abovementioned devices are able to operate in either of the following two modes under control of the instruction controller 235; a Single Output General Color Space (SOGCS) Conversion mode or a Multiple Output General Color Space (MOGCS) Conversion Mode. For more details on the data cache controller 240 and data cache 230, reference is made to the section entitled Data Cache Controller and Cache 240, 230 (Fig. 2).

Accurate color space conversion can be a highly non-linear process. For example, color space conversion of a RGB pixel to a single primary color component cyan) of the CYMK color space is theoretically linear, however in practice non- 15 linearities are introduced typically by the output device which is used to display the S-colour components of the pixel. Similarly for the color space conversion of the RGB pixel to the other primary color components (yellow, magenta or black) of the CYMK •color space. Consequently a non-linear colour space conversion is typically used to compensate for the non-linearities introduced on each colour component. The highly non-linear nature of the color conversion process requires either a complex transfer function to be implemented or a look-up table to be utilized. Given an input color space of, for example, 24 bit RGB pixels, a look-up table mapping each of these pixels to a single 8 bit primary color component of the CYMK color space cyan) would require over 16 megabytes. Similarly, a look-up table simultaneously mapping the 24 bit RGB pixels to all four 8 bit primary color components of the CYMK color space would require over 64 megabytes, which is obviously excessive. Instead, the main data path 242 (Fig. 2) uses a look-up table stored in the data cache 230 having sparsely located output color values corresponding to points in the input color space and interpolates between the output color values to obtain an intermediate output.

a. Single Output General Color Space (SOGCS) Conversion Mode In both the single and multiple output color conversion modes (SOGCS) and (MOGCS), the RGB color space is comprized of 24 bit pixels having 8 bit red, green and blue color components. Each of the RGB dimensions of the RGB color space is divided into 15 intervals with the length of each interval having a substantially inverse proportionality to the non-linear behavior of the transfer function between the RGB to CYMK color space of the printer. That is, where the transfer function has a highly non-linear behavior the interval size is reduced and where the transfer function has a more linear behavior, the size of the interval is increased. Preferably, the color space of each output printer is accurately measured to determine those non-linear portions of I- MNL 66- S its transfer function. However, the transfer function can be approximated or modelled based on know-how or measured characteristics of a type printer ink-jet). For each color channel of an input pixel, the color component value defines a position within one of the 15 intervals. Two tables are used by the main data path unit 242 to determine which interval a particular input color component value lies within and also to determine a fraction along the interval in which a particular input color component value lies. Of course, different tables may be used for output printers having different transfer functions.

As noted previously, each of the RGB dimensions is divided into 15 intervals.

In this way the RGB color space forms a 3-dimensional lattice of intervals and the input pixels at the ends of the intervals form sparsely located points in the input color space.

Further, only the output color values of the output color space corresponding to the endpoints of the intervals are stored in look-up tables. Hence, an output color value of an input color pixel can be calculated by determining the output color values corresponding to the endpoints of the intervals within which the input pixel lies and interpolating such output color values utilising the fractional values. This technique reduces the need for large memory storage.

Turning now to Fig. 56, there is illustrated 480 an example of determining for a particular input RGB color pixel, the corresponding interval and fractional values.

The conversion process relies upon the utilization of an interval table 482 and a *fractional table 483 for each 8 bit input color channel of the 24 bit input pixel. The 8 bit input color component 481, shown in a binary form in Fig. 56 having the example .:decimal number 4, is utilized as a look-up to each of the interval and fractional tables.

Hence, the number of entries in each table is 256. The interval table 482 provides a 4 bit output defining one of the intervals numbered 0 to 14 into which the input color component value 481 falls. Similarly, the fractional table 483 indicates the fraction within an interval that the input color value component 481 falls. The fractional table stores 8 bit values in the range of 0 to 255 which are interpreted as a fraction of 256.

Hence, for an input color value component 481 having a binary equivalent to the decimal value 4, this value is utilized to look-up the interval table 482 to produce an output value of 0. The input value 4 is also utilized to look-up the fractional table 483 to produce an output value of 160 which designates the fraction 160/256. As can be seen from the interval and fractional tables 482 and 483, the interval lengths are not equal. As noted previously, the length of the intervals are chosen according to the nonlinear behavior of the transfer function.

As mentioned above, the separate interval and fractional tables are utilized for each of the RGB color components resulting in three interval outputs and three fractional outputs. Each of the interval and fractional tables for each color component are loaded in the MUV buffer 250 (Fig. 2) and accessed by the main data path unit 242 1O:\CISRA\STAR\MASTER]MSTRV I HMXL 67 when required. The arrangement of the MUV buffer 250 for the color conversion process is as shown in Fig. 57. The MUV buffer 250 (Fig. 57) is divided into three areas 488, 489 and 490, one area for each color component. Each area e.g. 488 is further divided into a 4 bit interval table and a 8 bit fractional table. A 12 bit output 492 is retrieved by the main data path unit 242 from the MUV buffer 250 for. each input color channel. In the example given above of a single input color component having a decimal value 4, the 12 bit output will be 000001010000.

Turning now to Fig. 58, there is illustrated an example of the interpolation process. The interpolation process consists primarily of interpolation from one three dimensional space 500, for example RGB color space to an alternative color space, for example CMY or CMYK. The pixels PO to P7 form sparsely located points in the RGB input color space and having corresponding output color values CV(PO) to CV(P7) in the output color space. The output color component value corresponding to the input pixel Pi falling between the pixels PO to P7 is determined by; firstly, 15 determining the endpoints PO. of the intervals surrounding the input pixel Pi; secondly, determining the fractional components frac_r, frac_g and frac_b; and lastly interpolating between the output color values CV(PO) to CV(P7) corresponding to the endpoints PO to P7 using the fractional components.

The interpolation process includes a one dimensional interpolation in the red 20 direction to calculate the values temp 11, temp 12, temp 13, temp 14 in accordance with the following equations: temp 11 CV(PO> frac r (CV(P1) CV(PO)) temp 12 CV(P2) frac r (CV(P3) CV(P2)) temp 13 CV(P4 fracr (CV(P5) CV(P4)) temp 14 CV(P6) frac r (CV(P7) CV(P6)) Next, the interpolation process includes the calculation of a further one dimensional interpolation in the green (Gi direction utilising the following equations to calculate the values temp 21 and temp 22: temp 21 temp 11 frac_g (temp 12 temp 11) temp 22 temp 13 frac_g (temp 14 temp 13) Finally, the final dimension interpolation in the blue direction is carried out to calculate a final color output value in accordance with the following equation.

final temp 21 frag_b (temp 22 temp 21) JO:\CISR\STAR\MASTERIMSTRVI

HMXL

68 O Unfortunately, it is often the case that the input and output gamut may not match. In this respect, the output gamut may be more restricted that the input gamut and in this case, it is often necessary to clamp the gamut at the extremes. This often produces unwanted artefacts when converting using the boundary gamut colors. An example of how this problem can occur will now be explained with reference to Fig. 59, which represents a one dimensional mapping of input gamut values to output gamut values. It is assumed that output values are defined for the input values at points 510 and 511. However, if the greatest output value is clamped at the point 512 then the point 511 must have an output value of this magnitude. Hence, when interpolating between the two points 510 and 511, the line 515 forms the interpolation line and the input point 516 produces a corresponding output value 517. However, this may not be the best color mapping, especially where, without the gamut limitations, the output value would have been at the point 518. The interpolation line between 510 and 518 would produce an output value of 519 for the input point 516. The difference between the two output values 517 and 519 can often lead to unsightly artefacts, particularly when printing edge of gamut colors. To overcome this problem, the main data path unit can optionally calculate in an expanded output color space and then scale and clamp to the appropriate range utilising the following formula: oo 20 0 if x<63 out 2(x-64) if (64<x<191) (4) 255 if (192_< x) o* :Returning now to Fig. 58, it will be evident that the interpolation process can 25 either be carried out in the SOCGS conversion mode which converts RGB pixels to a eo(o single output color component (for example, cyan) or the MOGCS mode which converts RGB pixels to all the output color components simultaneously. Where color conversion is to be carried out for each pixel in an image, many millions of pixels may have to be independently color converted. Hence, in order for high speed operation, it is desirable to be able to rapidly locate the 8 values (PO-P7) around a particular input value.

As noted previously with respect to Fig. 57, the main data path unit 242 retrieves for each color input channel, a 12 bit output consisting of a 4 bit interval part and a 8 bit fractional part. The main data path unit 242 concatenates these 4 bit interval parts of the red, green and blue color channels to form a single 12 bit address (IR

I

G,

IB), as shown in Fig. 60 as 520.

Fig. 60 shows a data flow diagram illustrating the manner in which a single output color component 563 is obtained in response to the single 12 bit address 520.

The 12 bit address 520 is first fed to an address generator of the data cache controller [O\CISRA\STAR\MASTERJMSTRVI IIMXL 69 240, such as the generator 1881 (shown in Fig. 141) which generates 8 different 9 bit line and byte addresses 521 for memory banks (B

O

Bl,...B 7 The data cache 230 (Fig. 2) is divided into 8 independent memory banks 522 which can be independently addressed by the respective 8 line and byte addresses. The 12 bit address 520 is mapped by the address generator into the 8 line and byte addresses in accordance with the following table: Table 12: Address Comoosition for SOGCS Mode Bit Bit Bit Bank 7 R[3:1] G[3:1] B[3:1] Bank 6 R[3:1] G[3:1] B[3:1]+B[0] Bank 5 R[3:1] B[3:1] Bank 4 R[3:1] B[3:1]+B[0] Bank 3 G[3:1] B[3:1] Bank 2 G[3:1] B[3:1]+B[0] Bank 1 B[3:1] Bank 0 B[3:1] +B[0]

V

V

4* V

V~

V

V

V

V..

9 V V V.

V..

10 where BIT[8:6], BIT[5:3] and BIT[2:0] represent the sixth to eighth bits, the third to fifth bits and the zero to second bits of the 9 bit bank addresses respectively; and where G[3:1] and B[3:1] represent the first to third bits of the 4 bit intervals IR, IG and I B of the 12 bit address 520 respectively.

I5 Reference is made to memory bank 5 of Table 12 for a more detailed explanation of the 12 bit to 9 bit mapping. In this particular case, the bits 1 to 3 of the 4 bit red interval Ir of the 12 bit address 520 are mapped to bits 6 to 8 of the 9 bit address B5; bits 1 to 3 and bit 0 of the 4 bit green interval Io are summed and then mapped to bits 3 to 5 of the 9 bit address B5; and bits 1 to 3 of the 4 bit blue interval I b are mapped to bits 0 to 2 of the 9 bit address Each of the 8 different line and byte addresses 521 is utilized to address a respective memory bank 522 which consists of 512 x 8 bit entries, and the corresponding 8 bit output color component 523 is latched for each of the memory banks 522. As a consequence of this addressing method, the output color values of CV(PO) to CV(P7) correseponding to the endpoints PO to P7 may be located at different positions in the memory banks. For example, a 12 bit address of 0000 0000 0000 will result in the same bank address for each bank, ie 000 000 000. However a 12 bit address of 0000 0000 0001 will result in different bank addresses, ie a bank address of 000 000 000 for banks 7, 5. 3 and 1 and a bank address of 000 000 001 for banks 6, 4, lO:\CISPW\STAR\MASTERMSTRVI HIXL 70 O 2 and 0. It is in this way the eight single output color values CV(PO)-CV(P7) surrounding a particular input pixel value are simultaneously retrieved from respective memory banks and duplication of output color values in the memory banks can be avoided.

Turning now to Fig. 61, there is illustrated the structure of a single memory bank of the data cache 230 when utilized in the single color conversion mode. Each memory bank consists of 128 line entries 531 which are 32 bits long and comprize 4x8 bit memories 533 536. The top 7 bits of the memory address 521 are utilized to determine the corresponding row of data within the memory address to latch 542 as the memory bank output. The bottom two bits are a byte address and are utilized as an input to multiplexer 543 to determine which of the 4x8 bit entries should be chosen 544 for output. One data item is output for each of the 8 memory banks per clock cycle for return to the main data path unit 242. Hence, the data cache controller receives a 12 bit S: byte address from the operand organizer 248 (Fig. 2) and outputs in return to the S 15I operand organizers 247, 248. the 8 output color values for interpolation calculation by the main data path unit 242.

Returning to Fig. 60. the interpolation equations are implemented by the main 0 0 data path unit 242 (Fig. 2) in three stages. In the main data path unit, a first stage of multiplier and adder units eg. 550 which take as input the relevant color values output 20 by the corresponding memory banks eg. 522 in addition to the red fractional component 4404 o° 551 and calculate the 4 output values in accordance with stage 1 of the abovementioned equations. The outputs eg. 553, 554 of this stage are fed to a next stage unit 556 which .i utilizes the frac_g input 557 to calculate an output 558 in accordance with the aforementioned equation for stage 2 of the interpolation process. Finally, the output 25 558 in addition to other outputs eg. 559 of this stage are utilized 560 in addition to the 4444 frac_b input 562 to calculate a final output color 563 in accordance with the aforementioned equations.

The process illustrated in Fig. 60 is implemented in a pipelined manner so as to ensure maximum overall throughput. Further, the method of Fig. 60 is utilized when a single output color component 563 is required. For example, the method of Fig. 60 can be utilized to first produce the cyan color components of an output image followed by the magenta, yellow and black components of an output image reloading the cache tables between passes. This is particularly suitable for a four-pass printing process which requires each of the output colors as part of separate pass.

b. Multiple Output General Color Space Mode The co-processor 224 operates in the MOGCS mode in a substantially similar manner to the SOCGS mode, with a number of notable exceptions. In the MOGCS mode, the main data path unit 242, the data cache controller 240 and data cache of Fig.

2 co-operate to produce multiple color outputs simultaneously with four primary colors IO:\CISRA\STAR\MASTERMSTRV I HMXL 71 components being output simultaneously. This would require the data cache 230 to be four times larger in size. However, in the MOGCS mode of operation, in order to save storage space, the data cache controller 240 stores only one quarter of all the output color values of the output color space. The remaining output color values of the output color space are stored in a low speed external memory and are retrieved as required.

This particular apparatus and method is based upon the surprising revelation that the implementation of sparsely located color conversion tables in a cache system have an extremely low miss rate. This is based on the insight there is a low deviation in color values from one pixel to the next in most color images. In addition, there is a high probability the sparsely located output color values will be the same for neighboring pixels.

Turning now to Fig. 62 there will now be described the method carried out by the co-processor to implement multi-channel cached color conversion. Each input pixel ,is broken into its color components and a corresponding interval table value (Fig. 56) is o00° 15I determined as previously described resulting in the three 4 bit intervals Ir, Ig, Ib 4oo. •denoted 570. The combined 12 bit number 570 is utilized in conjunction with the :.,aforementioned table 12 to again derive eight 9-bit addresses. The addresses eg. 572 are then re-mapped as will be discussed below with reference to Fig. 63. and then are utilized to look up a corresponding memory bank 573 to produce four colour output 20 channels 574. The memory bank 573 stores 128x32 bit entries out of a total possible *So* 512x32 bit entries. The memory bank 573 forms part of the data cache 230 (Fig. 2) and is utilized as a cache as will now be described with reference to Fig. 63.

Turning to Fig. 63, the 9 bit bank input 578 is re-mapped as 579 so as to antialias memory patterns by re-ordering the bits 580-582 as illustrated. This reduces the likelihood of neighboring pixel values aliasing to the same cache elements.

o° The reorganized memory address 579 is then utilized as an address into the corresponding memory bank eg. 585 which comprizes 128 entries each of 32 bits. The 7 bit line address is utilized to access the memory 585 resulting in the corresponding output being latched 586 for each of the memory banks. Each memory bank, eg 585 has an associated tag memory which comprizes 128 entries each of 2 bits. The 7 bit line address is also utilized to access the corresponding tag in tag memory 587. The two most significant bits of the address 579 are compared with the corresponding tag in tag memory 587 to determine if the relevant output color value is stored in the cache.

These two most significant bits of the 9 bit address correspond to the most significant bits of the red and green data intervals (see Table 12). Thus in the MOGCS mode the RGB input color space is effectively divided into quadrants along the red and green dimensions where the two most significant bits of the 9 bit address designates the quadrant of the RGB input color space. Hence the output color values are effectively divided into four quadrants each designated by a two bit tag. Consequently the output IO:\CISRA\STAR\MASTERIMSTRV I UMXL 72 O color values for each tag value for a particular line are highly spaced apart in the output color space, enabling anti-aligning of memory patterns.

Where the two bit tags do not match a cache miss is recorded by the data cache controller and the corresponding required memory read is initiated by the data cache controller with the cache look up process being stalled until all values for that line corresponding to that two bit tag entry are read from an external memory and stored in the cache. This involves the reading of the relevant line of the color conversion table stored in the external memory. The process 575 of Fig. 63 is carried out for each of the memory banks eg. 573 of Fig. 62 resulting, depending on the cache contents, in a time interval elapsing before the results eg. 586 are output from each corresponding memory bank. Each of the eight 32 bit sets of data 586 are then forwarded to the main data path unit (242) which carries out the aforementioned interpolation process (Fig.

62) in three stages 590 592 to each of the colored channels simultaneously and in a **pipelined manner so as to produce four color outputs 595 for sending to a printer 15 device.

Experiments have shown that the caching mechanism as described with reference to Figs. 62 and 63 can be advantageously utilized as typical images have a cache miss-rate on average requiring between 0.01 and 0.03 cache line fetches per pixel. The utilization of the caching mechanism therefore leads to substantially reduced 20 requirements, in the typical case, for memory accesses outside of the data cache.

The instruction encoding for both color space conversion modes (Fig. utilized by the co-processor has the following structure: Table 12A: Instruction Encoding for Color Space Conversion Operand Description Internal Format External Format Operand A source pixels pixels packed stream Operand B multi output channel other multi channel csc color conversion tables tables Operand C Interval and Fraction I&F table format Tables Result pixels pixels packed stream bytes unpacked bytes unpacked bytes, packed stream IO:\CISRA\STAR\MNASTER)MSTRVI I MXL 73 O The instruction field encoding for color space conversion instruction is illustrated in Fig. 64 with the following minor opcode encoding for the color conversion instructions.

Table 13: Minor Opcode Encoding for Color Conversion Instructions Field Description 0 do not apply translation and clamping step to corresponding output value on this channel M 0 single channel color table format 1 multi channel color table format Fig. 65 shows a method of converting a stream of RGB pixels into CYMK color values according to the MOGCS mode. In step S 1 a stream of 24 bit RGB pixels are received by the pixel organiser 246 (Fig. In step S 2 the pixel organiser 246 determines the 4 bit interval values and the 8 bit fractional values of each input pixel from lookup tables, in the manner previously discussed with respect to Figs. 56 and 57.

The interval and fractional values of the input pixel designate which intervals and fractions along the intervals in which the input pixel lies. In step S 3 the main data path unit 242 concatenates the 4 bit intervals of the red, green and blue color components of the input pixel to form a 12 bit address word and supplies this 12 bit address word to the data cache controller 240 (Fig. In step S 4 the data cache controller 240 o converts this 12 bit address word into 8 different 9 bit addresses, in the manner previously discussed with respect to Table 12 and Fig. 62. These 8 different addresses o..1 designate the location of the 8 output color values CV(PO)-CV(P7) in the respective o 20 memory banks 573 (Fig. 62) of the data cache 230 (Fig. In step S 5 the data cache controller 240 (Fig. 2) remaps the 8 different 9 bit addresses in the manner described previously with respect to Fig. 63. In this way, the most significant bit of the red and green 4 bit intervals are mapped to the two most significant bits of the 9 bit addresses.

In step S 6 the data cache controller 240 then compares the two most significant bits of the 9 bit addresses with respective 2 bit tags in memory 587 (Fig.

63). If the 2 bit tag does not correspond to the two most significant bits of the 9 bit addresses, then the output color values CV(P0)-CV(P7) do not exist in the cache memory 230. Hence, in step S7, all the output color values corresponding to the 2 bit tag entry for that line are read from external memory into the data cache 230. If the 2 bit tag corresponds to these two most significant bits of the 9 bit addresses, then the data cache controller 240 retrieves in step S 8 the eight output color values CV(PO)- CV(P7) in the manner discussed previously with respect to Fig. 62. In this way, the [O:\CISRA\STAR\MASTERIMSTRV I I IMXL 74 eight output color values CV(PO)-CV(P7) surrounding the input pixel are retrieved by the main data path unit 242 from the data cache 230. In step S 7 the main data path unit 242 interpolates the output color values CV(PO)-CV(P7) utilising the fractional values determined in step S2 and outputs the interpolated output color values.

It will be evident to the man skilled in the art, that the storage space of the data cache storage may be reduced further by dividing the RGB color space and the corresponding output color values into more than four quadrants, for example 32 blocks. In the latter case, the data cache can have the capacity of storing only a 1/32 block of output color values.

It will also be evident to the man skilled in the art, that the data caching arrangement utilized in the MOGCS mode can also be used in a single output general conversion mode. Hence, in the latter mode the storage space of the data cache can also be reduced.

3.17.3 JPEG Coding/Decoding It is well known that a large number of advantages can be obtained from storing images in a compressed format especially in relation to the saving of memory and the speed of transferring images from one place to another. Various popular standards have arizen for image compression. One very popular standard is the JPEG standard and for a full discussion of the implementation of this standard reference is 20 made to the well known text JPEG: Still Image Data Compression Standard by S .Pennebaker and Mitchell published 1993 by Van Nostrand Reinhold. The co-processor 224 utilizes a subset of the JPEG standard in the storage of images. The JPEG standard has the advantage that large factor compression can be gained with the retention of substantial image quality. Of course, other standards for storing compressed images could be utilized. The JPEG standard is well-known to those skilled in the art, and the various JPEG alternative implementations readily available in the marketplace from manufacturers including JPEG core products for incorporation into ASICS.

The co-processor 224 implements JPEG compression and decompression of images consisting of 1, 3 or 4 color components. One-color-component images may be meshed or unmeshed. That is, a single-color-component can be extracted from meshed data or extracted from unmeshed data. An example of meshed data is three-color components per pixel datum RGB per pixel datum), and an example of unmeshed data is where each color component for an image is stored separately such that each color component can be processed separately. For three color component images the co-processor 224 utilizes one pixel per word, assuming the three color channels to be encoded in the lowest three bytes.

The JPEG standard decomposes an image into small two dimensional units called minimum coded units (MCU). Each minimal coded unit is processed separately.

The JPEG coder 241 (Fig. 2) is able to deal with MCU's which are 16 pixels wide and IO:\CISRA\STAR\MASTERIMSTRVI I INIXL 75 8 pixels high for down sampled images or MCU's which are 8 pixels wide and 8 pixels high for images that are not to be down sampled.

Turning now to Fig. 66, there is illustrated the method utilized for down sampling three component images.

The original pixel data 600 is stored in the MUV buffer 250 (Fig. 2) in a pixel form wherein each pixel 601 comprizes Y, U and V components of the YUV color space. This data is first converted into a MCU unit which comprizes four data blocks 601 604. The data blocks comprize the various color components, with the Y component being directly sampled 601, 602 and the U and V components being subsampled in the particular example of Fig. 13 to form blocks 603, 604. Two forms of sub-sampling are implemented by the co-processor 224, including direct sampling where no filtering is applied and odd pixel data is retained while even pixel data is discarded. Alternatively. filtering of the U and V components can occur with averaging of adjacent values taking place.

15 An alternative form of JPEG sub-sampling is four color channel sub-sampling as illustrated in Fig. 67. In this form of sub-sampling, pixel data blocks of 16 x 8 pixels 610 each have four components 611 including an opacity component in addition to the usual Y, U. V components. This pixel data 410 is sub-sampled in a similar manner to that depicted in Fig. 66 20 However, in this case, the opacity channel is utilized to form data blocks 612, 613.

Turning now to Fig. 68, there is illustrated the JPEG coder 241 of Fig. 2 in more detail. The JPEG encoder/decoder 241 is utilized for both JPEG encoding and decoding. The encoding process receives block data via bus 620 from the pixel organizer 246 (Fig. The block data is stored within the MUV buffer 250 which is utilized as a block staging area. The JPEG encoding process is broken down into a number of well defined stages. These stages include: 1. taking a discrete cosine transform (DCT) via DCT unit 621; 2. quantising the DCT output 622; 3. placing the quantized DCT co-efficients in a zig zag order, also carried out by quantizer unit 622; 4. predictively encoding the DC DCT co-efficients and run length encoding the AC DCT co-efficients carried out by co-efficient coder 623; and variable length encoding the output of the co-efficients coder stage, carried out by Huffman coder unit 624. The output is fed via multiplexer 625 and Rbus 626 to the result organizer 629 (Fig. 2).

The JPEG decoding process is the inverse of JPEG encoding with the order of operations reversed. Hence, the JPEG decoding process comprizes the steps of inputting on Bus 620 a JPEG block of compressed data. The compressed data is I 11MXL 76 transferred via Bus 630 to the Huffman coder unit 624 which Huffman decodes data into DC differences and AC run lengths. Next, the data is forwarded to the coefficients coder 623 which decodes the AC and DC co-efficients and puts them into their natural order. Next, the quantizer unit 622 dequantizes the DC co-efficients by multiplying them by a corresponding quantization value. Finally, the DCT unit 621 applies an inverse discrete cosine transform to restore the original data which is then transferred via Bus 631 to the multiplexer 625 for output via Bus 626 to the Result Organizer. The JPEG coder 241 operates in the usual manner via standard CBus interface 632 which contains the registers set by the instructions controller in order to begin operation of the JPEG coder. Further, both the quantizer unit 622 and the Huffman coder 624 require certain tables which are loaded in the data cache 230 as required. The table data is accessed via an OBus interface unit 634 which connects to the operand organizer B unit 247 (Fig. 2) which in turn interacts with the data cache controller 240.

15 The DCT unit 621 implements forward and inverse discrete cosine transforms on pixel data. Although many different types of DCT transforming implementations are known and discussed in the Still Image Data Compression Standard (ibid), the DCT 621 implements a high speed form of transform more fully discussed in the section herein entitled A Fast DCT Apparatus, which may implement a DCT transform operation in accordance with the article entitled A Fast DCT-SQ Scheme for Images by Arai et. al., published in The Transactions of the IEICE, Vol E71, No. 11, November 1988 at page 1095.

The quantizer 622 implements quantization and dequantization of DCT components and operates via fetching relevant values from corresponding tables stored in the data cache via the OBus interface unit 634. During quantization, the incoming data stream is divided by values read from quantization tables stored in the data cache.

The division is implemented as a fixed point multiply. During dequantization, the data stream is multiplied by values kept in the dequantization table.

Turning to Fig. 69. there is illustrated the dequantizer 622 in more detail. The quantizer 622 includes a DCT interface 640 responsible for passing data to and receiving data from the DCT module 621 via a local Bus. During quantization, the quantizer 622 receives two DCT co-efficients per clock cycle. These values are written to one of the quantizers internal buffers 641, 642. The buffers 641, 642 are dual ported buffers used to buffer incoming data. During quantization, co-efficient data from the DCT sub-module 621 is placed into one of the buffers 641, 642. Once the buffer is full, the data is read from the buffer in a zig zag order and multiplied by multiplier 643 with the quantization values received via OBus interface unit 634. The output is forwarded to the co-efficient coder 623 (Fig. 68) via co-efficient coder interface 645. While this is happening, the next block of co-efficients is being written [O:\CISA\STAR\MASTER JMSTRV I I MXL 77 O to the other buffer. During JPEG decompression, the quantizer module dequantizes decoded DCT co-efficients by multiplying them by values stored in the table. As the quantization and dequantization operations are mutually exclusive, the multiplier 643 is utilized during quantization and dequantization. The position of the co-efficient within the block of 8x8 values is used as the index into the dequantization table.

As with quantization, the two buffers 641, 642 are utilized to buffer incoming co-efficient data from the co-efficient coder 623 (Fig. 68). The data is multiplied with its quantization value and written into the buffers in reverse zig zag order. Once full, the dequantized co-efficients are read out of the utilized buffer in natural order, two at a time, and passed via DCT interface 640 to the DCT sub-module 621 (Fig. 68). Hence the co-efficients coder interface module 645 is responsible for interfacing to the coefficients coder and passes data and receives data from the coder via a local Bus. This module also reads data from buffers in zig zag order during compression and writes data to the buffers in reverse zig zag order during decompression. Both the DCT 15 interface module 640 and the CC interface module 645 are able to read and write from buffers 641, 642. Hence, address and control multiplexer 647 is provided to select which buffer each of these interfaces is interacting with under the control of a control module 648, which comprizes a state machine for controlling all the various modules in the quantizer. The multiplier 643 can be a 16x8, 2's complement multiplier which 20 multiplies DCT co-efficients by quantization table values.

Turning again to Fig. 68, the co-efficient coder 623 performs the functions of: predictive encoding/decoding of DC co-efficients in JPEG mode; and S: run length encoding/decoding of AC co-efficients in JPEG mode.

Preferably, the co-efficient coder 623 is also able to be utilized for predictive encoding/decoding of pixels and memory copy operations as required independently of JPEG mode operation. The co-efficient coder 623 implements predictive and run length encoding and decoding of DC and AC co-efficients as specified in the Pink Book. A standard implementation of predictive encoding and predictive decoding in addition to JPEG AC co-efficients run lengthing encoding and decoding as specified in the JPEG standard is implemented.

The Huffman coder 624 is responsible for Huffman encoding and decoding of the JPEG data train. In Huffman encoding mode, the run length encoded data is received from the co-efficients coder 623 and utilized to produce a Huffman stream of packed bytes. Alternatively. or in addition, in Huffman decoding, the Huffman stream is read from the PBus interface 620 in the form of packed bytes and the Huffman decoded co-efficients are presented to the co-efficient coder module 623. The Huffman coder 624 utilizes Huffman tables stored in the data cache and accessed via OBus interface 634. Alternatively. the Huffman table can be hardwired for maximum speed.

I HMXL 78 o o oo ooeo o *oo o« When utilising the data cache for Huffman coding, the eight banks of the data cache store data tables as follows with the various tables being described in further detail hereinafter.

Table 14: Huffman and Quantization Tables as stored in Data Cache Bank Description 0 This bank hold the 256, 16 bit entries of a EHUFCO DC_1 or EHUFCO table. The least significant bit of the index chooses between the two 16 bit items in the 32 bit word. All 128 lines of this bank of memory are used.

1 This bank holds the 256, 16 bit entries of a EHUFCO DC_2 table. The least significant bit of the index chooses between the two 16 bit items in the 32 bit word. All 128 lines of this bank of memory are used.

2 This bank holds the 256, 16 bit entries of a EHUFCOAC_1 table. The least significant bit of the index chooses between the two 16 bit items in the 32 bit word. Al 128 lines of this bank of memory are used.

3 This bank holds the 256, 16 bit entries of a EHUFCOAC_2 table. The least significant bit of the index chooses between the two 16 bit items in the 32 bit word. All 128 lines of this bank of memory are used.

4 This bank holds the 256, 4 bit entires of a EHUFSI DC_1 or EHUFSI table, as well as the 256, 4 bit entires of a EHUFSI DC 2 table. All 128 lines of this bank of memory are used.

This bank holds the 256, 4 bit entries of a EHUFSI AC_1 table, as well as the 256, 4 bit entries of a EHUFSIAC_2 table. All 128 lines of this bank of memory are used.

6 Not used 7 This banks holds the 128, 24 bit entries of the quantization table. It occupies the least significant 3 bytes of all 128 lines of this bank of memory.

Turning now to Fig. 70, the Huffman coder 624 consists primarily of two independent blocks being an encoder 660 and a decoder 661. Both blocks 660,661 share the same OBus interface via a multiplexer module 662. Each block has its own I HMXL 79 O input and output with only one block active at a time, depending on the function performed by the JPEG encoder.

a. Encoding During encoding in JPEG mode, Huffman tables are used to assign codes of varying lengths (up to 16 bits per code) to the DC difference values and to the AC runlength values, which are passed to the HC submodule from the CC submodule. These tables have to be preloaded into the data cache before the start of the operation. The variable length code words are then concatenated with the additional bits for DC and AC co-efficients (also passed from the CC submodule, then packed into bytes. A X'OO byte is stuffed in if an X'FF byte is obtained as a result of packing. If there is a need for an RSTm marker it is inserted. This may require byte padding with bits of the last Huffman code and X'00 byte stuffing if the padded byte results in X'FF. The need for an RSTm marker is signalled by the CC submodule. The HC submodule inserts the EOI marker at the end of image, signalled by the "final" signal on the PBus- CC slave interface. The insertion procedure of the EOI marker requires similar packing, padding and stuffing operations as for RSTm markers. The output stream is finally passed as packed bytes to the Result Organizer 249 for writing to external memory.

In non-JPEG mode data is passed to the encoder from the CC submodule 20 (PBus-CC slave interface) as unpacked bytes. Each byte is separately encoded using tables preloaded into the cache (similarly to JPEG mode), the variable length symbols are then assembled back into packed bytes and passed to the Results Organizer 249.

.i The very last byte in the output stream is padded with l's.

b. Decoding Two decoding algorithms are implemented: fast (real time) and slow 1: (versatile). The fast algorithm works only in JPEG mode, the versatile one works both in JPEG and non-JPEG modes.

The fast JPEG Huffman decoding algorithm maps Huffman symbols to either DC difference values or AC run-length values. It is specifically tuned for JPEG and assumes that the example Huffman tables (K3, K4, K5 and K6) were used during compression. The same tables are hard wired in to the algorithm allowing decompression without references to the cache memory. This decoding style is intended to be used when decompressing images to be printed where certain data rates need to be guaranteed. The data rate for the HC submodule decompressing a band (a block between RSTm markers) is almost one DC/AC co-efficient per clock cycle. One clock cycle delay between the HC submodule and CC sub-module may happen for each X'OO stuff byte being removed from the data stream, however this is strongly data dependent.

I HMXL 80 The Huffman decoder operates in a faster mode for the extraction of one O Huffman symbol per clock cycle. The fast Huffman decoder is described in the section herein entitled Decoder of Variable Length Codes.

Additionally. the Huffman decoder 661 also implements a heap-based slow decoding algorithm and has a structure 670 as illustrated in Fig. 71.

For a JPEG encoded stream, the STRIPPER 671 removes the X'00 stuff bytes, the X'FF fill bytes and RSTm markers, passing Huffman symbols with concatenated additional bits to the SHIFTER 672. This stage is bypassed for Huffman-only coded streams.

The first step in decoding a Huffman symbol is to look up the 256 entries HUFVAL table stored in the cache addressing it with the first 8 bits of the Huffman data stream. If this yields a value (and the true length of the corresponding Huffman symbol), the value is passed on to the OUTPUT FORMATTER 676. and the length of the symbol and the number of the additional bits for the decoded value are fed back to 15 the SHIFTER 672 enabling it to pass the relevant additional bits to the OUTPUT FORMATTER 676 and align the new front of the Huffman stream presented to the decoding unit 673. The number of the additional bits is a function of the decoded value. If the first look up does not result in a decoded value, which means that the Huffman symbol is longer than 8 bits, the heap address is calculated and successive heap (located in the cache. too) accesses are performed following the algorithm until a match is found or an "illegal Huffman symbol" condition met. A match results in identical behavior as in case of the first match and "illegal Huffman symbol" generates an interrupt condition.

The algorithm for heap-based decoding algorithm is as follows: loop until end of image set symbol length N to 8 get first 8 bits of the input stream into INDEX fetch HUFVAL(INDEX) if HUFVAL(INDEX) OOxx 0000 111 (ILL) signal "illegal Huffman symbol" exit elsif HUFVAL(INDEX) Innn eeee eeee (HIT) pass nnn bits to eeee eeee as the value pass symbol length N decimal (nnn)/*000 as symbol length 8*/ adjust the input stream break else/* HUFVAL (INDEX) Oliii iiii iiii (MISS)*/ set HEAPINDEX ii iiii iiii (we assume heapbase 0) IO:\CISRA\STAR\MASTERIMSTRV I HMXL 81 e set N 9 if 9th bit of the input stream 0 increment HEAPINDEX fi fetch VALUE HEAP (HEAPINDEX) (code for 9th bit) loop if VALUE 0001 0000 1111 (ILL) signal "illegal Huffman symbol" exit elsif VALUE 1000 eeee eeee pass eeee eeee as the value pass symbol length N *adjust the input stream break else/* VALUE Oliii iiii iiii (MISS) set N N 1 (HEAPINDEX ii iiii iiii) if Nth bit of the input stream 0 increment HEAPINDEX fi fetch VALUE HEAP (HEAPINDEX) p ool pool The STRIPPER 671 removes any X'00 stuff bytes, X'FF fill bytes and RSTm 25 markers from the incoming JPEG 671 coded stream and passes "clean" Huffman symbols with concatenated additional bits to the shifter 672. There are no additional bits in Huffman-only encoding, so in this mode the passed stream consists of Huffman symbols only.

The shifter 672 block has a 16 bit output register in which it presents the next Huffman symbol to the decoding unit 673 (bitstream running from MSB to LSB).

Often the symbol is shorter than 16 bits, but it is up to the decoding unit 673 to decide how many bits are currently being analysed. The shifter 672 receives a feedback 678 from the decoding unit 673, namely the length of the current symbol and the length of the following additional bits for the current symbol (in JPEG mode), which allows for a shift and proper alignment of the beginning of the next symbol in the shifter 672.

The decoding unit 673 implements the core of the heap based algorithm and interfaces to the data cache via the OBus 674. It incorporates a Data Cache fetch block, lookup value comparator, symbol length counter, heap index adder and a IO:\CISRA\STAR\MASTERIMSTRVI

HMXI.

82 decoder of the number of the additional bits (the decoding is based on the decoded value). The fetch address is interpreted as follows: Table 15: Fetch Address Field (bits) Description [32:25] Index into dequantization tables.

[24:19] Not used.

[18:9] Index into the heap.

Index into Huffman decode table.

The OUTPUT FORMATTER block 676 packs decoded 8-bit values (standalone Huffman mode), or packs 24-bit value additional bits RSTm marker information (JPEG mode) into 32-bit words. The additional bits are passed to the OUTPUT FORMATTER 676 by the shifter 672 after the decoding unit 673 decides on 10 the start position of the additional bits for the current symbol. The OUTPUT FORMATTER 673 also implements a 2 deep FIFO buffer using a one word delay for prediction of the final value word. During the decoding process, it may happen that the shifter 672 (either fast or slow) tries to decode the trailing padding bits at the end of the input bitstream. This situation is normally detected by the shifter and instead of asserting the "illegal symbol" interrupt, it asserts a "force final" signal. Active "force final" signal forces the OUTPUT FORMATTER 676 to signal the last but one decoded word as "final" (this word is still present in the FIFO) and discard the very last word which does not belong to the decoded stream.

The Huffman encoder 660 of Fig. 70 is illustrated in Fig. 72 in more detail.

o.

20 The Huffman encoder 660 maps byte data into Huffman symbols via look up tables and includes a encoding unit 681, a shifter 682 and a OUTPUT FORMATTER 683 with the lookup tables being accessed from the cache.

Each submitted value 685 is coded by the encoding unit 681 using coding tables stored in the data cache. One access to the cache 230 is needed to encode a symbol, although each value being encoded requires two tables, one that contains the corresponding code and the other that contains the code length. During JPEG compression, a separate set of tables is needed for AC and DC co-efficients. If subsampling is performed, separate tables are required for subsampled and non subsampled components. For non-JPEG compression, only two tables (code and size) are needed. The code is then handled by the shifter 682 which assembles the outgoing stream on bit level. The Shifter 682 also performs RSTm and EOI markers insertion which implies byte padding, if necessary. Bytes of data are then passed to the OUTPUT FORMATTER 683 which does stuffing (with X'00 bytes), filling with X'FF [O:\CISRA\STAR\MASTERIMSTRV I IMXL 83 r bytes, also the FF bytes leading the marker codes and formatting to packed bytes. In the non-JPEG mode, only formatting of packed bytes is required.

Insertion of X'FF bytes is handled by the shifter 682, which means that the output formatter 683 needs to tell which bytes passed from the shifter 682 represent markers, in order to insert an X'FF byte before. This is done by having a register of tags which correspond to bytes in the shifter 682. Each marker, which must be on byte boundaries anyway, is tagged by the shifter 682 during marker insertion. The packer 683 does not insert stuff bytes after the X"FF" bytes preceding the markers. The tags are shifted synchronously with the main shift register.

The Huffman encoder uses four or eight tables during JPEG compression, and two tables for straight Huffman encoding. The tables utilized are as follows: Table 16: Tables Used by the Huffman Encoder Name Size Description EHUFSI 256 Huffman code sizes. Used during straight Huffman encoding. Uses the coded value as an index.

EHUFCO 256 Huffman code values used during straight Huffman encoding. Uses the coded value as an index.

EHUFSI DC 1 16 Huffman codes sizes used to code DC coefficients during JPEG compression. Uses magnitude category as the index.

EHUFCO DC 1 16 Huffman code values used to code DC coefficients during JPEG compression. Uses magnitude category as an index. Used for subsampled blocks.

EHUFSI DC 2 16 Huffman code sizes used to code DC coefficients during JPEG compression. Uses magnitude category as an index. Used for subsampled blocks.

EHUFCO DC 2 16 Huffman code sizes used to code DC coefficients during JPEG compression. Uses magnitude category as an index. Used for subsampled blocks.

(O:\ClSRA\STAR\MASTERIMSTRV I IiMXL 84 r Name Size Description EHUFSI AC_1 256 Huffman code sizes used to code AC coefficients during JPEG compression. Uses magnitude category and run-length as an index.

EHUFCOAC 1 256 Huffman code sizes used to code AC coefficients during JPEG compression. Uses magnitude category and run-length as an index.

EHUFSIAC 2 256 Huffman code sizes used to code AC coefficients during JPEG compression for subsampled components. Uses magnitude category and run-length as an index.

EHUFCO AC 2 256 Huffman code sizes used to code AC coefficients during JPEG compression for subsampled components. Uses magnitude category and run-length as an index.

3.17.4 Table Indexing Huffman tables are stored locally by the co-processor data cache 230. The 5 data cache 230 is organized as a 128 line, direct mapped cache, where each line comprizes 8 words. Each of the words in a cache line are separately addressable, and the Huffman decoder uses this feature to simultaneously access multiple tables.

Because the tables are small 256 entries), the 32 bit address field of the OBus can carry indexes into multiple tables.

As noted previously, in JPEG slow decoding mode, the data cache is utilized for storing various Huffman tables. The format of the data cache is as follows: Table 17: Bank Address for Huffman and Quantization Tables Bank Description 0 to 3 These banks hold the 1024, 16 bit entries of the heap. The least significant index bit selects between the two 16 bit words in each bank. All 128 lines of the four banks of memory are used.

[O:\CIRA\sTrAR\MASTERJMSTRV I hMXL 85 Bank Description 4 This bank holds the 512, least significant 8 bits of the 12 bit entries of the DC Huffman decode table. The least significant two bits of the index chooses between the four, byte items in the 32 bit word. All 128 line of this bank of memory are used.

This bank holds the 512, least significant 8 bits of the 12 bit entires of the AC Huffman decode table. The least significant two bits of the index chooses between the four, byte items in the 32 bit word. All 128 lines of this bank of memory are used.

6 This bank holds the most significant 4 bits of both the DC and AC Huffman decode tables. The least significant 2 bits of each index chooses between the 4 respective nibbles within each word.

7 This bank holds the 128, 24 bit entires of the quantization table. It occupies the least significant 3 bytes of all 128 lines of this bank of memory.

Prior to each JPEG instruction being executed by the JPEG coder 241 (Fig. 2) the appropriate image width value in the image dimensions register (PO_IDR) or (RO_IDR) must be set. As with other instructions, the length of the instruction refers to the number of input data items to be processed. This includes any padding data and accounts for any sub-sampling options utilized and for the number of color channels used.

All instructions issued by the co-processor 224 may utilize two facilities for limiting the amount of output data produced. These facilities are most useful for instructions where the input and output data sizes are not the same and in particular where the output data size is unknown, such as for JPEG coding and decoding. The facilities determine whether the output data is written out or merely discarded with everything else being as if the instruction was properly processed. By default, these facilities are normally disabled and can be enabled by enabling the appropriate bits in the RO_CFG register. JPEG instructions however, include specific option for setting these bits. Preferably, when utilising JPEG compression, the co-processor 224 provides facilities for "cutting" and "limiting" of output data.

Turning to Fig. 73. there is now described the process of cutting and limiting.

An input image 690 may be of a certain height 691 and a certain width 692. Often, [O:\CIS RA\STAR\MASTERJ MSTRV I I MXL 86 r only a portion of the image is of interest with other portions being irrelevant for the purposes of printing out. However, the JPEG encoding system deals with 8x8 blocks of pixels. It may be the case that, firstly, the image width is not an exact multiple of 8 and additionally, the section of interest comprising MCU 695 does not fit across exact boundaries. An output cut register, RO_cut specifies the number of output bytes at 696 at the beginning of the output data stream to discard. Further, an output limit register, RO_LMT specifies the maximum number of output bytes to be produced. This count includes any bytes that do not get written to memory as a result of the cut register.

Hence, it is possible to target a final output byte 698 beyond which no data is to be outputted.

There are two particular cases where the cut and limited functionality of the JPEG decoder is considered to be extremely useful. The first case, as illustrated in Fig. 74, is the extraction or decompression of a sub-section 700 of one strip 701 of a decompressed image. The second useful case is illustrated in Fig. 75 wherein the extraction or decompression of a number of complete strips (eg. 711, 712 and 713) is required from an overall image 714.

The instruction format and field encoding for JPEG instructions is as illustrated in Fig. 76. The minor opcode fields are interpreted as follows: Table 18: Instruction Word Minor Opcode Fields Field Description D 0 encode(compress) 1 decode(decompress) M 0 single color channel 1 multi channel 4 0 three channel 1 four channel S 0 do not use a sub/up sampling regime 1 use a subsampling regime H 0 use fast Huffman coding 1 use general purpose Huffman coding C 0 do not use cut register 1 use cut register T 0 do not truncate on output 1 truncate on output F 0 do not low pass filter before subsampling 1 low pass filter before subsampling [O:\CIRA\WTAR\MASTERJMSTRv I HMXL 87 3.17.5 Data Coding Instructions Preferably, the co-processor 224 provides for the ability to utilize portions of the JPEG coder 241 of Fig. 2 in other ways. For example, Huffman coding is utilized for both JPEG and many other methods of compression. Preferably, there is provided data coding instructions for manipulating the Huffman coding unit only for hierarchial image decompression. Further, the run length coder and decoder and the predictive coder can also be separately utilized with similar instructions.

3.17.6 A Fast DCT Apparatus Conventionally, a discrete cosine transform (DCT) apparatus as shown in Fig. 77 performs a full two-dimensional transformation of a block of 8x8 pixels by first performing a 1-D DCT on the rows of the 8x8 pixel block. It then performs another 1- D DCT on the columns of the 8x8 pixel block. Such an apparatus typically consists of an input circuit 1096, an arithmetic circuit 1104, a control circuit 1098, a transpose memory circuit 1090, and an output circuit 1092.

5 The input circuit 1096 accepts 8-bit pixels from the 8x8 block. The input circuit :i 1096 is coupled by intermediate multiplexers 1100, 1102 to the arithmetic circuit 1004.

The arithmetic circuit 1104 performs mathematical operations on either a complete row or column of the 8x8 block. The control circuit 1098 controls all the other circuits, S and thus implements the DCT algorithm. The output of the arithmetic circuit is coupled to the transpose memory 1090, register 1095 and output circuit 1092. The transpose memory is in turn connected to multiplexer 1100, which provides output to :the next multiplexer 1102. The multiplexer 1102 also receives input from the register 1094. The transpose circuit 1090 accepts 8x8 block data in rows and produces that data in columns. The output circuit 1092 provides the coefficients of the DCT S.performed on a 8x8 block of pixel data.

In a typical DCT apparatus, it is the speed of the arithmetic circuit 1104 that basically determines the overall speed of the apparatus, since the arithmetic circuit 1104 is the most complex.

The arithmetic circuit 1104 of Fig. 77 is typically implemented by breaking the arithmetic process down into several stages as described hereinafter with reference to Fig. 78. A single circuit is then built that implements each of these stages 1114, 1148, 1152, 1156 using a pool of common resources, such as adders and multipliers. Such a circuit 1104 is mainly disadvantageous due to it being slower than optimal, because a single, common circuit is used to implement the various stages of circuit 1104. This includes a storage means used to store intermediate results. Since the time allocated for the clock cycle of such a circuit must be greater or equal to the time of the slowest stage of the circuit, the overall time is potentially longer than the sum of all the stages.

Fig. 78 depicts a typical arithmetic data path, in accordance with the apparatus of Fig. 77, as part of a DCT with four stages. The drawing does not reflect the actual [O:\CI5RA\STAR\MASTER1MSTRV1 HMXL 88 implementation, but instead reflects the functionality. Each of the four stages 1144, 1148, 1152, and 1156 is implemented using a single, reconfigurable circuit. It is reconfigured on a cycle-by-cycle basis to implement each of the four arithmetic stages 1144, 1148, 1152, and 1156 of the 1-D DCT. In this circuit, each of the four stages 1144, 1148, 1152, and 1156 uses pool of common resources adders and multipliers) and thus minimises hardware.

However, the disadvantage of this circuit is that it is slower than optimal. The four stages 1144, 1148, 1152, and 1156 are each implemented from the same pool of adders and multipliers. The period of the clock is therefore determined by the speed of the slowest stage, which in this example is 20 ns (for block 1144). Adding in the delay (2ns each) of the input and output multiplexers 1146 and 1154 and the delay (3ns) of the flip-flop 1150, the total time is 27 ns. Thus, the fastest this DCT implementation *oocan run at is 27 ns.

Pipelined DCT implementations are also well known. The drawback with such 'I implementations is that they require large amounts of hardware to implement. Whilst the present invention does not offer the same performance in terms of throughput, it offers an extremely good performance/size compromise, and good speed advantages over most of the current DCT implementations.

Fig. 79 shows a block diagram of the preferred form of discrete cosine S 20 transform unit utilized in the JPEG coder 241 (Fig. 2) where pixel data is inputted to an input circuit 1126 which captures an entire row of 8-bit pixel data. The transpose memory 1118 converts row formatted data into column formatted data for the second pass of the two dimensional discrete cosine transform algorithm. Data from the input circuit 1126 and the transpose memory 1118 is multiplexed by multiplexer 1124, with .25 the output data from multiplexer 1124 presented to the arithmetic circuit 1122. Results data from the arithmetic circuit 1122 is presented to the output circuit 1120 after the second pass of the process. The control circuit 1116 controls the flow of data through the discrete cosine transform apparatus.

During the first pass of the discrete cosine transform process row data from the image to be transformed, or transformed image coefficients to be transformed back to pixel data is presented to the input circuit 1126. During this first pass, the multiplexer 1124 is configured by the control circuit 1116 to pass data from the input circuit 1126 to the arithmetic circuit 1122.

Turning to Fig. 80, there is shown the structure of the arithmetic circuit 1122 in more detail. In the case of performing a forward discrete cosine transform, the results from the forward circuit 1138 which is utilized to calculate the forward discrete cosine transform is selected via the multiplexer 1142, which is configured in this way by the control circuit 1116. When an inverse discrete cosine transform is to be performed, the output from the inverse circuit 1140 is selected via the multiplexer I HMXL 89 1142, as controlled by the control circuit 1126. During the first pass, after each row vector has been processed by the arithmetic circuit 1122 (configured in the appropriate way by control circuit 11161. that vector is written into the transpose memory 1118.

Once all eight row vectors in an 8x8 block have been processed and written into the transpose memory 1118, the second pass of the discrete cosine transform begins.

During the second pass of either the forward or inverse discrete cosine transforms, column ordered vectors are read from the transpose memory 1118 and presented to the arithmetic circuit 1122 via the multiplexer 1124. During this second pass, the multiplexer 1124 is configured by the control circuit to ignore data from the input circuit 1136 and pass column vector data from the transpose memory 1118 to the arithmetic circuit 1122. The multiplexer 1142 in the arithmetic circuit 1122 is configured by the control circuit 1116 to pass results data from the inverse circuit 1140 to the output of the arithmetic circuit 1122. When results from the arithmetic circuit

S.

1122 are available, they are captured by the output circuit 1120 under direction from I_ the control circuit 1116 to be outputted sometime later.

The arithmetic circuit 1122 is completely combinatorial, in that is there are no storage elements in the circuit storing intermediate results. The control circuit 1116 knows how long it takes for data to flow from the input circuit 1136, through the multiplexer 1124 and through the arithmetic circuit 1122, and so knows exactly when to °o o S 20 capture the results vector from the outputs of the arithmetic circuit 1122 into the output circuit 1120. The advantage of having no intermediate stages in the arithmetic circuit 1122 is that no time is wasted getting data in and out of intermediate storage elements, but also the total time taken for data to flow through the arithmetic circuit 1122 is equal to the sum of all the internal stages and not N times the delay of the longest stage (as with conventional discrete cosine transform implementations), where N is the number of stages in the arithmetic circuit.

Referring to Fig. 81. the total time delay is simply the sum of the four stage 1158, 1160, 1162, 1164, which is 20 ns 10 ns 12 ns 15 ns 57 ns, which is faster that the circuit depicted in Fig. 78. The advantage of this circuit is that it provides an opportunity to reduce the overall system's clock period. Assuming that four clock cycles are allocated to getting a result from the circuit depicted in Fig. 81, the fastest run time for the entire DCT system would be 57/4 ns (14.25 ns), which is a significant improvement over the circuit in Fig. 78 which only allows for a DCT clock period of substantially 27 ns.

An examplary implementation of the present DCT apparatus might, but not necessarily, use the DCT algorithm proposed in the paper to The Transactions of the IEICE, Vol. E 71. No. 11. November 1988, entitled A Fast DCT-SQ Scheme for Images at page 1095 by Yukihiro Arai. Takeshi Agui and Masayuki Nakajima. By implementing this algorithm in hardware, it can then easily be placed in the current 1O:\CISRA\STAR\MASTERIMSTRV I HMXL 90 DCT apparatus in the arithmetic circuit 1122. Likewize, other DCT algorithms may be implemented in hardware in place of arithmetic circuit 1122.

3.17.7 Huffman Decoder The aspects of the following embodiment relate to a method and apparatus for variable-length codes interleaved with variable length bit fields. In particular, the embodiments of the invention provide efficient and fast, single stage (clock cycle) decoding of variable-length coded data in which byte aligned and not variable length encoded data is removed from the encoded data stream in a separate pre-processing block. Further, information about positions of the removed byte-aligned data is passed to the output of the decoder in a way which is synchronous with the data being decoded. In addition, it provides fast detection and removal of not byte-aligned and not variable length encoded bit fields that are still present in the pre-processed input data.

Oooo The preferred embodiment of the present invention preferably provides for a fast Huffman decoder capable of decoding a JPEG encoded data at a rate of one Huffman 15 symbol per clock cycle between marker codes. This is accomplished by means of separation and removal of byte aligned and not Huffman encoded marker headers, o marker codes and stuff bytes from the input data first in a separate pre-processing block. After the byte aligned data is removed, the input data is passed to a S.combinatorial data-shifting block, which provides continuous and contiguous filling up of the data decode register that consequently presents data to a decoding unit. Positions of markers removed from the original input data stream are passed on to a marker shifting block, which provides shifting of marker position bits synchronously with the input data being shifted in the data shifting block.

The decoding unit provides combinatorial decoding of the encoded bit field presented to its input by the data decode register. The bit field is of a fixed length of n bits. The output of the decoding unit provides the decoded value and the actual length of the input code, where m is less than or equal to n. It also provides the length of a variable length bit field, where is greater than or equal to 0. The variable-length bit field is not Huffman encoded and follows immediately the Huffman code. The n-long bit field presented to the input of the decoding unit may be longer than or equal to the actual code. The decoding unit determines the actual length of the code and passes it together with the length of the additional bits to a control block. The control block calculates a shift value driving the data and marker shifting blocks to shift the input data for the next decoding cycle.

The apparatus of the invention can comprise any combinatorial decoding unit, including ROM, RAM, PLA or anything else based as long as it provides a decoded value, the actual length of the input code, and the length of the following not Huffman encoded bit field within a given time frame.

IO:\CISRA\STAR\MASTERIMSTRV I IIMXL 91 In the illustrated embodiment, the decoding unit outputs predictively encoded DC difference values and AC run-length values as defined in JPEG standard. The not Huffman encoded bit fields, which are extracted from the input data simultaneously with decoded values, represent additional bits determining the value of the DC and AC coefficients as defined in JPEG standard. Another kind of not Huffman encoded bit fields, which are removed from the data present in the data decode register, are padding bits as defined in JPEG standard that precede byte-aligned markers in the original input data stream. These bits are detected by the control block by checking the contents of a padding zone of the data register. The padding zone comprises up to k most significant bits of the data register and is indicated by the presence of a marker bit within k most significant bits of the marker register, position of said marker bit limiting the length of the padding zone. If all the bits in the padding zone are identical (and equal to is in case of JPEG standard), they are considered as padding bits and are removed from the data register accordingly without being decoded. The contents of the data and marker 15 registers are then adjusted for the next decoding cycle.

The exemplary apparatus comprises an output block that handles formatting of the outputted data according to the requirements of the preferred embodiment of the invention. It outputs the decoded values together with the corresponding not variable length encoded bit fields, such as additional bits in JPEG, and a signal indicating position of any inputted byte aligned and not encoded bit fields, such as markers in JPEG, with respect to the decoded values.

:Data being decoded by the JPEG coder 241 (Fig. 2) is JPEG compatible and comprizes variable length Huffman encoded codes interleaved with variable length not encoded bit fields called "additional bits", variable length not encoded bit fields called 25 "padding bits" and fixed length, byte aligned and not encoded bit fields called "markers", "stuff bytes" and "fill bytes". Fig. 82 shows a representative example of input data.

The overall structure and the data flow in the Huffman decoder of the JPEG coder 241 is presented in Fig. 83 and Fig. 84, where Fig. 83 illustrates the architecture of the Huffman decoder of the JPEG data in more detail. The stripper 1171 removes marker codes (code FFXXhex, XX being non zero), fill bytes (code FFhex) and stuff bytes (code 0 0 hex following code FFhex), that is all byte aligned components of the input data, which are presented to the stripper as 32 bit words. The most significant bit of the first word to be processed is the head of the input bit stream. In the stripper 1171, the byte aligned bit fields are removed from each input data word before the actual decoding of Huffman codes takes place in the downstream parts of the decoder.

The input data arrives at the stripper's 1171 input as 32-bit words, one word per clock cycle. Numbering of the input bytes 1211 from 0 to 3 is shown in Fig. If a byte of a number is removed because it is a fill byte, a stuff byte or belongs to a IO:\CISRA\STAR\MASTERIMSTRVI IHMXL 92 marker, the remaining bytes of numbers down to 0 are shifted to the left on the output of the stripper 1171 and take numbers down to 1. Byte 0 becoming a "don't care" byte. Validity of bytes outputted by the stripper 1171 is also coded by means of separate output tags 1212 as shown in Fig. 85. The bytes which are not removed by the stripper 1171 are left aligned on the stripper's output. Each byte on the output has a corresponding tag indicating if the corresponding byte is valid passed on by the stripper 1171), or invalid removed by the stripper 1171) or valid and following a removed marker. The tags 1212 control loading of the data bytes into the data register 1182 through the data shifter and loading of marker positions into the marker register 1183 through the marker shifter. The same scheme applies if more than one byte is removed from the input word: all the remaining valid bytes are shifted to the left and the corresponding output tags indicate validity of the output bytes. Fig. 85 provides examples 1213 of output bytes and output tags for various example combinations of input bytes.

Returning to Fig. 83, the role of the preshifter and postshifter blocks 1172, 1173, 1180. 1181 is to assure loading of the data into the corresponding data register 1182 and marker register 1183 in a contiguous way whenever there is enough room in the data register and the marker register. The data shifter and the marker shifter blocks, which consist of the respective pre- and postshifters, are identical and 20 identically controlled. The difference is that while the data shifter handles data passed by the stripper 1171, the marker shifter handles the tags only and its role is to pass .marker positions to the output of the decoder in a way synchronous with the decoded Huffman values. The outputs of the postshifters 1180, 1181 feed directly to the respective registers 1182. 1183, as shown in Fig. 83.

In the data preshifter 1172, as also shown in Fig. 86, data arriving from the stripper 1171 is firstly extended to 64 bits by appending 32 zeroes to the least significant bit 1251. Then the extended data is shifted in a 64 bit wide barrel shifter 1252 to the right by a number of bits currently present in the data register 1182. This number is provided by the control logic 1185 which keeps track of how many valid bits are there in the data 1182 and marker 1183 registers. The barrel shifter 1252 then presents 64 bits to the multiplexer block 1253, which consists of 64 2x1 elementary multiplexers 1254. Each elementary 2x1 multiplexer 1254 takes as inputs one bit from the barrel shifter 1252 and one bit from the data register 1182. It passes the data register bit to the output when this bit is still valid in the data register. Otherwize, it passes the barrel shifter's 1252 bit to the output. The control signals to all the elementary multiplexers 1254 are decoded from a control block's shift control 1 signals as shown in Fig. 86, which are also shown in Fig. 87 as preshifter control bits of register 1223. The outputs of the elementary multiplexers 1254 drive a barrel shifter 1255. It shifts left by the number of bits provided on a 5 bit control signal shift control

HMXL

93 2 as shown in Fig 86. These bits represent the number of bits consumed from the data register 1182 by the decoding of the current data, which can be either the length of the currently decoded Huffman code plus the number of the following additional bits, or the number of padding bits to be removed if padding bits are currently being detected, or zero if the number of valid data bits in the data register 1182 is less then the number of bits to be removed. In this way, the data appearing on the output of barrel shifter 1255 contains new data to be loaded into the data register 1182 after a single decoding cycle. The contents of the data register 1182 changes in such a way that the leading (most significant) bits are shifted out of the register as being decoded, and 0, 8, 16, 24 or 32 bits from the stripper 1171 are added to the contents of the data register 1182. If there are not enough bits in the data register 1182 to decode them, data from the stripper 1171, if available, is still loaded in the current cycle. If there is no data available from the stripper 1171 in the current cycle, the decoded bits from the data register 1182 are still removed if there is a sufficient amount of them, otherwize the content of the data register 1182 does not change.

o=o The marker preshifter 1173, postshifter 1181 and the marker register 1183 are units identical to the data preshifter 1172, data postshifter 1180 and the data register 1182, respectively. The data flow inside units 1173, 1181 and 1183 and among them is also identical as the data flow among units 1172, 1180 and 1182. The same control signals are provided to both sets of units by the control unit 1185. The difference is only in the type of data on the inputs of the marker preshifter 1173 and data preshifter 1172, as well as in how the contents of the marker register 1183 and the data register 1182 are used. As shown in Fig. 88, tags 1261 from the stripper 1171 come as eight bit words, which provide two bits for each corresponding byte of data going to the data 25 register 1182. According to the coding scheme shown in Fig. 85, an individual two bit tag indicating valid and following a marker byte has 1 on the most significant position.

Only this most significant position of each of the four tags delivered by the stripper 1171 simultaneously is driven to the input 1262 of the marker preshifter 1173. In this way, on the input to the marker preshifter there may be bits set to 1 indicating positions of the first encoded data bits following markers. At the same time, they mark the positions of the first encoded data bits in the data register 1182 which follow a marker.

This synchronous behavior of the marker position bits in the marker register 1183 and the data bits in the data register 1182 is used in the control block 1185 for detection and removal of padding bits, as well as for passing marker positions to the output of the decoder in a way synchronous with the decoded data. As mentioned, the two preshifters (data 1172 and marker 1173), postshifters (data 1180 and marker 1181) and registers (data 1182 and marker 1183) get the same control signals which facilitates fully parallel and synchronous operation.

tO:\CISRA\STAR\MASTERIMSTRV I IMXL 94 The decoding unit 1184, also shown in Fig. 89 gets the sixteen most significant bits of the data register 1182 which are driven to a combinatorial decoding unit 1184 for extraction of a decoded Huffman value, the length of the present input code being decoded and the length of the additional bits following immediately the input code S (which is a function of the decoded value). The length of the additional bits is known after the corresponding preceding Huffman symbol is decoded, so is the starting position of the next Huffman symbol. This effectively requires, if speed of one value decoded per clock cycle is to be maintained, that decoding of a Huffman value is done in a combinatorial block. Preferably, the decoding unit comprizes four PLA style decoding tables hardwired as a combinatorial block taking a 16-bit token on input from the data register 1182 and producing a Huffman value (8 bits), the length of the corresponding Huffman-encoded symbol (4 bits) and the length of the additional bits (4 bits) as illustrated in Fig. 89.

Removal of padding bits takes place during the actual decoding when a S 15 sequence of padding bits is detected in the data register 1182 by a decoder of padding bits which is part of the control unit 1185. The decoder of padding bits operates as shown in Fig. 90. Eight most significant bits of the marker register 1183, 1242 are monitored for presence of a marker position bit. If a marker position bit is detected, all the bits in the data register 1182, 1241 which correspond to, that is have the same positions as, the bits preceding the marker bit in the marker register 1242 are recognized as belonging to a current padding zone. The content of the current padding zone is checked by the detector of padding bits 1243 for l's. If all the bits in the current padding zone are l's, they are recognized as padding bits and are removed from the data register. Removal is done by means of shifting of the contents of the data register 1182, 1241 (and at the same time the marker register 1183, 1242) to the left using the respective shifters 1172, 1173, 1180, 1181 in one clock cycle, as in normal decode mode with the difference that no decoded value is outputted. If not all the bits in the current padding zone are l's, a normal decode cycle is performed rather than a padding bits removal cycle. Detection of padding bits takes place each cycle as described, in case there are some padding bits in the data register 1182 to be removed.

The control unit 1185 is shown in detail in Fig. 87. The central part of the control unit is the register 1223 holding the current number of valid bits in the data register 1182. The number of valid bits in the marker register 1183 is always equal to the number of valid bits in the data register 1182. The control unit preforms three functions. Firstly, it calculates a new number of bits in the data register 1182 to be stored in the register 1223. Secondly, it determines control signals for the shifters 1172, 1173, 1180, 1181. 1186, 1187 decoding unit 1184, and the output formatter 1188. Finally, it detects padding bits in the data register 1182, as described above.

[OACISRA\STAR\MASTER]MSTRV I I 'MXL 95 The new number of bits in the data register 1182 (new_nob) is calculated as the current number of bits in the data register 1182 (nob) plus the number of bits (nos) available for loading from the stripper 1171 in the current cycle, less the number of bits (nor) removed from the data register 1182 in the current cycle, which is either a decode cycle or a padding bits removal cycle. The new number of bits is calculated as follows: new nob nob nos nor The respective arithmetic operations are done in adder 1221 and subtractor 1222. It should be noted that (nos) can be 0 if there is no data available from the stripper 1171 in the current cycle. Also, (nor) can be 0 if there is no decoding done in the current cycle because of shortage of bits in the data register 1182, which means there are less bits in the data register than the sum of the current code length and the following additional bits length as delivered by the control unit 1185. The value (new_nob) may exceed 64 and block 1224 checks for this condition. In such a case, the stripper 1171 is stalled and no new data is loaded. Multiplexer 1233 is used for :15 zeroing the number of bits to be loaded from the stripper 1171. A corresponding signal for stalling the stripper 1171 is not shown. Signal "padding cycle" driven by decoder **1231 controls multiplexer 1234 to select either the number of padding bits or the number of decoded bits (that is the length of code bits plus additional bits) as number of bits to be removed (nor). If the number of the decoded bits is greater than the number (nob) of the bits in the data register, which is checked in comparator 1228, the effective number of bits to shift as provided for multiplexer 1234 is set to zero by a complex NAND gate 1230. As a result, (nor) is set to zero and no bits are removed from the data register. The output of multiplexer 1234 is also used to control postshifters 1182 and 1183. The width of the data register 1182 must be chosen in a way preventing a S 25 deadlock situation. This means that at any time either there needs to be room in the data register to accommodate the maximum number of bits available from the stripper ".1171 or sufficient number of valid' bits to be removed as a result of a decode or a padding of bits removed cycle.

Calculation of the number of bits to be removed in a decode cycle is performed by adder 1226. Its operands come from the combinatorial decoding unit 1184. As the code length of 16 bits is coded as "0000" by the decoding unit, "or_reduce" logic 1225 provides encoding of "'0000" into "10000", yielding a correct unsigned operand.

This operand together with the output of subtractor 1227 provide control signals to the output formatting shifters 1186 and 1187.

Block 1229 is used for detection of EOI (End Of Image) marker position. The EOI marker itself is removed by the stripper 1171, but there can be some padding bits which are the very last bits of the data and which used to precede the EOI marker before its removal in the stripper 1171. The comparator 1229 checks if the number of bits in the data register 1182, stored in register 1223 is less than eight. If it is, and [O:\CISRA\STAR\MASTERIMSTRVI

HMXL

96 there is no more data to come from the stripper 1171 (that is the data register 1182 holds all the remaining bits for of the data unit being decoded), the remaining bits define the size of the padding zone before the removed EOI marker. Further handling of the padding zone and possible removal of padding bits is identical to the procedure S applied in case of padding bits before RST markers, which has been described before.

Barrel shifters 1186. 1187 and output formatter 1188 play a support role and depending on the embodiment may have a different implementation or may not be implemented at all. Control signals to them come from the control unit 1185, as described above. The abpreshifter (additional bits preshifter) 1186 takes 32 bits from the data register as input and shifts them to the left by the length of the Hiuffman code being presently decoded. In this way, all the additional bits following the code being presently decoded appear left aligned on the output of the barrel shifter 1186 which is also the input to the barrel shifter 1187. The abpostshifter (additional bits postshifter) 1187 adjusts the position of the additional bits from left aligned to right aligned in an S 15 11 bit field, as used in the output format of the data and shown in Fig. 91. The additional bits field extends from bit 8 to bit 18 in the output word format 1196 and some of the most significant bits may be invalid, depending on the actual number of the additional bits. This number in encoded on bits 0 to 3 of 1196, as specified by the JPEG standard. If a different format of the output data is adopted, the barrel shifters 1186 and 1187 and their functionality may change accordingly.

S The output formatter block 1188 packs the decoded values, which in JPEG standard are DC and AC coefficients, (1196, bits 0 to 7) and a DC coefficient indicator (1196, bit 19) passed by the control unit 1185 together with the additional bits (1196, bits 8 to 18) passed by the abpostshifter 1187 and the marker position bit (1196, bit 23) from the marker register 1183 into words according to the format presented in Fig. 91. The output formatter 1188 also handles any particular requirements as to the output interface of the decoder. The implementation of the output formatter is normally expected to change if the output interface changes as a result of different requirements.

The foregoing described Huffman decoder provides a highly effective form of decoding providing a high speed decoding operation.

3.17.8 Image Transformation Instructions These instructions implement general affine transformations of source images.

The operation to construct a portion of a transformed image falls generally into two broad areas. These include firstly working out which parts of the source image are relevant to constructing the current output scanline and, if necessary, decompressing them. The second step normally comprizes necessary sub-sampling and/or interpolation to construct the output image on a pixel by pixel basis.

Turning to Fig. 92. there is illustrated a flow chart of the steps required 720 to calculate the value of a destination pixel assuming that the appropriate sections of the 1O:\CISRA\STAR\MASTERIMSTRV I IIIXL 97 source image have been decompressed. Firstly. the relevant sub-sampling, if present, must be taken into account 721. Next, two processes are normally implemented, one involving interpolation 722 and the other being sub-sampling. Normally interpolation and sub-sampling are alternative steps, however in some circumstances interpolation and sub-sampling may be used together. In the interpolation process, the first step is to find the four surrounding pixels 722, then determine if pre-multiplication is required 723, before performing bilinear interpolation 724. The bilinear interpolation step 724 is often computationally intensive and limits the operation of the image transformation process. The final step in calculating a destination pixel value is to add together the possibly bilinear interpolated sub-samples from the source image. The added together pixel values can be accumulated 727 in different possible ways to produce destination image pixels of 728.

The instruction word encoding for image transformation instructions is as illustrated in Fig. 93 with the following interpretation being placed on the minor opcode 15 fields.

Table 19: Instruction Word Minor Opcode Fields Field Description S 0 bi-linear interpolation is used on the four surrounding source image pixels to determine the actually sampled value 1 sampled value is snapped to the closest source image pixel value off[3:0] 0 do not apply the offset register (mdp_por) to the corresponding channel 1 apply the offset register (mdp_por) to the corresponding channel P 0 do not pre-multiply source image pixels 1 pre-multiply source image pixels C 0 do not clamp output values 1 clamp output underflows to 0x00 and overflows to OxFF A 0 do not take absolute value of output values 1 take absolute value of output values before wrapping or clamping 1O:\CISRA\STAR\MASTER)MSTRVI HMXL 98 The instruction operand and result fields are interpreted as follows: Table 20: Instruction Operand and Results Word Operand Description Internal External Format Format Operand A kernel descriptor short or long kernel descriptor table Operand B Source Image other image table format Pixels Operand C unused Result pixels pixies packed stream, unpacked bytes Operand A points to a data structure known as a "kernel descriptor" that describes all the information required to define the actual transformation. This data *structure has one of two formats (as defined by the L bit in the A descriptor). Fig. 94 illustrates the long form of kernel descriptor coding and Fig. 95 illustrates the short form of encoding. The kernel descriptor describes: 1. Source image start co-ordinates 730 (unsigned fixed point. 24.24 resolution).

Location is at the top left of the image.

2. Horizontal 731 and vertical 732 (sub-sample) deltas (2's complement fixed point, 24.24. resolution) 3. A 3 bit bp field 733 defining the location of the binary point within the fixed point matrix co-efficients as described hereinafter.

4. Accumulation matrix co-efficients 735 (if present). These are of "variable" .,point resolution of 20 binary places (2's complement), with the location of the binary °point implicitly specified by the bp field.

An rl field 736 that indicates the remaining number of words in the kernel descriptor. This value is equal to the number of rows times the number of columns minus 1.

The kernel co-efficients in the descriptor are listed row by row, with elements of alternate rows listed in reverse direction, thereby forming a zig zag pattern.

Turning now to Fig. 96, the operand B consists of a pointer to an index table indexing into scan lines of a source image. The structure of the index table is as illustrated in Fig. 96, with the operand B 740 pointing to an index table 741 which in turn points to scan lines (eg. 742) of the required source image pixels. Typically, the index table and the source image pixels are cacheable and possibly located in the local memory.

[O:\CISRA\STARMASTERIMSTRVI HMXL 99 The operand C stores the horizontal and vertical sub-sample rate. The horizontal and vertical sub-sample rates are defined by the dimensions of the subsample weight matrix which are specified if the C descriptor is present. The dimensions of the matrix r and c are encoded in the data word of the image S transformation instruction as illustrated in Fig. 97.

Channel N of a resultant pixel P[N] is calculated in accordance with the following equation: (.offset[n]- mdppor:0000)+ w, s(x +rAx,y +cAy)[n] r c Internally, the accumulated value is kept to 36 binary places per channel. The location of the binary point within this field is specified by the BP field. The BP field indicates the number of leading bits in the accumulated result to discard. The 36 bit accumulated value is treated as a signed 2's compliment number and is clamped or 15 wrapped as specified. In Fig. 98, there is illustrated an example of the interpretation of the BP field in co-efficient encoding.

3.17.9 Convolution Instructions Convolutions, as applied to rendering images, involves applying a two dimensional convolution kernel to a source image to produce a resultant image.

Convolving is normally used for such matters as edge sharpening or indeed any image filter. Convolutions are implemented by the co-processor 224 in a similar manner to image transformations with the difference being that, in the case of transformations the kernel is translated by the width of the kernel for each output pixel, in the case of convolutions, the kernel is moved by one source pixel for each output pixel.

25 If a source image has values S(x,y) and a n x m convolution kernel has values then the nth channel of the convolution H[n] of S and C is given by: 9 H(x,y)[n]=(I.offset[n].mdppor:000)+ C S where i e andj e The interpretation of the offset value, the resolution of intermediate results and the interpretation of the bp field are the same as for Image Transformation instructions.

In Fig. 99, there is illustrated an example of how a convolution kernel 750 is applied to a source image 751 to produce a resultant image 752. Source image address generation and output pixel calculations are performed in a similar manner to that for image transformation instructions. The instruction operands take a similar form to image transformations. In Fig. 100, there is illustrated the instruction word encoding [O:\CISRA\WTAR\MASTER]MSTRV I IIMXL 100for convolution various fields.

instructions with the following interpretation being applied to the 9S 9 S 5* *9 9

OSS*

9 Table 21: Instruction Word Field Description S 0 bi-linear interpolation is used on the four surrounding source image pixels to determine the actually sampled value 1 sampled value is snapped to the closest source image pixel value C 0 do not clamp resultant vector values 1 clamp result vector values: underflow to 0x00, overflow to OxFF P 0 do not pre-multiply input pixels 1 pre multiply input pixels A 0 do not take absolute value of output values 1 take absolute value of output values before wrapping or clamping off[3:0] 0 do not apply the offset register to this channel 1 apply the offset register to this channel 3.17.10 Matrix Multiplication Matrix multiplication is utilized for many things including being utilized for color space conversion where an affine relationship exists between two color spaces.

Matrix multiplication is defined by the following equation: a r' bo.o bo., bo.2 bo.3 bo a r bt o bl. b.2 b b. v a.

b2 o b b b2.

4 b3.

0 b3, b, a- The matrix multiplication instruction operands and results have the following format: .9 9 9 *r 9 9**O I HMXL 101 Table 22: Instruction Operand and Results Word Operand Description Internal External Format Format Operand A source image pixels pixels packed stream Operand B matrix co-efficients other image table format Operand C unused Result pixels pixels packed stream, unpacked bytes The instruction word encoding for matrix multiplication instructions as illustrated in Fig. 101 with the following table summarising the minor opcode fields.

Table 23: Instruction Word Field Description C 0 do not clamp resultant vector values.

1 clamp resultant vector values: underflow to 0x00, overflow to OxFF P 0 do not pre-multiply input pixels 1 pre-multiply input pixels A 0 do not take absolute value of output values 1 take absolute value of output values before wrapping or clamping 3.17.11 Halftoning The co-processor 224 implements a multi-level dither for halftoning. Anything from 2 to 255 is a meaningful number of halftone levels. Data to be halftoned can be either bytes (ie. unmeshed or one channel from meshed data) or pixels (ie. meshed) as long as the screen is correspondingly meshed or unmeshed. Up to four output channels (or four bytes from the same channel) can be produced per clock, either packed bits (for bi-level halftoning) or codes (for more than two output levels) which are either packed together in bytes or unpacked in one code per bye.

The output half-toned value is calculated using the following formula: (p x (1 1) d)/255 Where p is the pixel value 255), 1 is the number of levels (21 <255) and d is the dither matrix value (0<d< 2 5 4 The operand encoding is as follows: IO:\CISRA\STAR\MASTERIMSTRV I HMXL 102 Table 24: Instruction Operand and Results Word Operand Description Internal External S Format Format Operand A source image pixels packed stream pixels source image packed bytes. packed stream bytes unpacked bytes Operand B dither matrix co- pixels, packed packed stream, efficients bytes, unpacked unpacked bytes bytes Operand C unused Result halftone codes pixels, packed bytes packed stream, unpacked bytes unpacked bytes In the instruction word encoding, the minor op code specifies a number of halftone levels. The operand B encoding is for the halftone screen and is encoded in 5 the same way as a compositing tile.

3.17.12 Hierarchial Image Format Decompression Hierarchial image format decompression involves several stages. These stages include horizontal interpolation, vertical interpolation, Huffman decoding and residual merging. Each phase is a separate instruction. In the Huffman decoding step, the residual values to be added to the interpolated values from the interpolation steps are Huffman coded. Hence, the JPEG decoder is utilized for Huffman decoding.

In Fig. 102, there is illustrated the process of horizontal interpolation. The output stream 761 consists of twice as much data as the input stream 762 with the last data value 763 being replicated 764. Fig. 103 illustrates horizontal interpolation by a 15 factor of 4.

In the second phase of hierarchial image format decompression, rows of pixels are up sampled by a factor of two or four vertically by linear interpolation. During this phase, one row of pixels is on operand A and the other row is on operand B.

When vertically interpolating, either by a factor of two or four, the output data stream contains the same number of pixels as each input stream. In Fig. 104, there is illustrated an example of vertical interpolation wherein two input data streams 770, 771 are utilized to produce a first output stream 772 having a factor of two interpolation or a second output stream 773 having a factor of 4 interpolation. In the case of pixel interpolation, interpolation occurs separately on each of the four channels of four channel pixels.

[O:\CISRM\STAR\MASTERIMSTRV I HNIXL 103 The residual merging process involves the bytewize addition of two streams of data. The first stream (operand A) is a stream of base values and the second stream (operand B) is a stream of residual values.

In Fig. 105, there is illustrated two input streams 780, 781 and a corresponding output stream 782 for utilising the process of residual merging.

In Fig. 106 there is illustrated the instruction word encoding for hierarchial image format instructions with the following table providing the relevant details of the minor op code fields.

Table 25: Instruction Word Minor Opcode Fields Field Description R 0 interpolation 1 residual merging V 0 horizontal interpolation 1 vertical interpolation F 0 interpolate by a factor of 2 1 interpolate by a factor of 4 C 0 do not clamp resultant values 1 clamp resultant values: underflow to 0x00, overflow to OxFF 3.17.13 Memory Copy Instructions These instructions are divided into two specifically disjointed groups.

a. General purpose data movement instructions These instructions utilize the normal data flow path through the co-processor 224, comprising the input interface module, input interface switch 252, pixel organizer 246, JPEG coder 241, result organizer 249 and then the output interface module. In this case, the JPEG coder module sends data straight through without applying any operation.

Other instructions include data manipulation operations including: packing and unpacking sub-byte values (such as bits, two bit values and four bit values) to a byte packing and unpacking bytes within a word aligning meshing and unmeshing byte lane swapping and duplicating memory clearing replicating values 1IMXL 104- 9 The data manipulation operation is carried out by a combination of the pixel organizer (on input) and the result organizer (on output). In many cases, these instructions can be combined with other instructions.

b. Local DNIA instructions No data manipulation takes place. As seen in Fig. 2 data transfer occurs (in either direction) between the Local Memory 236 and the Peripheral Interface 237.

These instructions are the only ones for which execution can be overlapped with some other instruction. A maximum of one of these instructions can execute simultaneously with a "non overlapped" instruction.

In memory copy instructions, operand A represents the data to be copied and the result operand represents the target address of the memory copy instructions. For general purpose memory copy instructions, the particular data manipulation operation is specified by the operand B for input and operand C for output operand words.

3.17.14 Flow Control Instructions The flow control instructions are a family of instructions that provide control *over various aspect of the instruction execution model as described with reference to Fig. 9. The flow control instructions include both conditional and unconditional jumps enabling the movement from one virtual address to another when executing a stream of instructions. A conditional jump instruction is determined by taking a co-processor or register, masking off any relevant fields and comparing it to given value. This provides for reasonable generality of instructions. Further, flow control instructions include wait instructions which are typically used to synchronize between overlapped and nonoverlapped instructions or as part of micro-programming.

In Fig. 107, there is illustrated instruction when encoding for flow control 25 instructions with the minor opcodes being interpreted as follows: S"Table 26: Instruction Word Minor Opcode Fields Field Description type 00 jump 01 wait C 0 unconditional jump 1 condition jump S 0 use Operand B as Condition Register and Operand C as Condition mask 1 any interrupt condition set N 0 jump if condition is true 1 dont jump if condition is true O 0 wait on non-overlapped instruction to finish 1 wait on overlapped instruction to finish [O:\CISRA\STAR\MASTERJMSTRV I IIMXL ii 105 In respect of Jump Instructions, the operand A word specified the target address of the jump instruction. If the S bit of the Minor Opcode is set to 0, then operand B specified a co-processor register to use as the source of the condition. The value of the operand B descriptor specifies the address of the register, and the value of the operand B word defines a value to compare the contents of the register against. The operand C word specifies a bitwize mask to apply to the result. That is, the Jump Instruction's condition is true of the bitwize operation: (((register_value xor Operand B) and Operand C) 0x00000000) Further instructions are also provided for accessing registers for providing full control at the micro programmed level.

3.18 Modules of the Accelerator Card Turning again to Fig. 2, there will now be provided further separate description of the various modules.

3.18.1 Pixel Organizer S 15 The pixel organizer 246 addresses and buffers data streams from the input interface switch 252. The input data is stored in the pixel organizer's internal memory

S..

or buffered to the MUV buffer 250. Any necessary data manipulation is performed S.upon the input stream before it is delivered to the main data path 242 or JPEG coder 241 as required. The operating modes of the pixel organizer are configurable by the usual CBus interface. The pixel organizer 246 operates in one of five modes, as specified by a PO_CFG control register. These modes include: Idle Mode where the pixel organizer 246 is not performing any operations.

Sequential Mode when input data is stored in an internal FIFO and the pixel organizer 246 sends out requests for data to the input interface switch 252, generating S 25 32 bit addresses for this data.

Color Space Conversion Mode when the pixel organizer buffers pixels for color space conversion. In addition, requests are made for interval and fractional values stored in the MUV buffer 250.

JPEG Compression Mode when the pixel organizer 246 utilizes the MUV buffer to buffer image data in the form of MCU's.

Convolution and Image Transformation Mode when the pixel organizer 246 stores matrix co-efficients in the MUV buffer 250 and passes them, as necessary, to the main data path 242.

The MUV buffer 250 is therefore utilized by the pixel organizer 246 for both main data path 242 and JPEG coder 241 operations. During color space conversion, the MUV RAM 250 stores the interval and fractional tables and they are accessed as 36 bits of data (four color channels) x (4 bit interval values and 8 bit fractional values).

For image transformation and convolution, the MUV RAM 250 stores matrix coefficients and related configuration data. The co-efficient matrix is limited to 16 rows x [O:\CISRA\STAR\MASTERIMSTRV I IIMXL 106 O 16 columns with each co-efficient being at a maximum 20 bits wide. Only one coefficient per clock cycle is required from the MUV RAM 250. In addition to coefficient data, control information such as binary point, source start coordinates and sub-sample deltas must be passed to the main data path 242. This control information is fetched by the pixel organizer 246 before any of the matrix co-efficients are fetched.

During JPEG compression, the MUV buffer 250 is utilized by the pixel organizer 246 to double buffer MCU's. Preferrably, the technique of double buffering is employed to increase the performance of JPEG compression. One half of the MUV RAM 250 is written to using data from the input interface switch 252 while the other half is read by the pixel organizer to obtain data to send to the JPEG coder 241. The pixel organizer 246 is also responsible for performing horizontal sub-sampling of color components where required and to pad MCU's where an input image does not have a size equal to an exact integral number of MCUs.

The pixel organizer 246 is also responsible for formatting input data including byte lane swapping, normalization, byte substitution, byte packing and unpacking and replication operations as hereinbefore discussed with reference to Fig. 32 of the 0 accompanying drawings. The operations are carried out as required by setting the pixel organizers registers.

oo,. Turning now to Fig. 108, there is shown the pixel organizer 246 in more detail. The pixel organizer 246 operates under the control of its own set of registers contained within a CBus interface controller 801 which is interconnected to the ,instruction controller 235 via the global CBus. The pixel organizer 246 includes an operand fetch unit 802 responsible for generating requests from the input interface S* switch 252 for operand data needed by the pixel organizer 246. The start address for operand data is given by the PO_SAID register which must be set immediately before execution. The PO SAID register may also hold immediate data, as specified by the L bit in the PO DMR register. The current address pointer in stored in the PO_CDP register and is incremented by the burst length of any input interface switch request.

When data is fetched into the MUV RAM 250, the current offset for data is concatenated with a base address for the MUV RAM 250 as given by the PL_MUV register.

A FIFO 803 is utilized to buffer sequential input data fetched by the operand fetch unit 802. The data manipulation unit 804 is responsible for implementing for implementing the various manipulations as described with reference to Fig. 32. The output of the data manipulation unit is passed to the MUV address generator 805 which is responsible for passing data to the MUV RAM 250, main data path 242 or JPEG coder 241 in accordance with configuration registers. A pixel organizer control unit 806 is a state machine that generates the required control signals for all the sub-modules in the pixel organizer 246. Included in these signals are those for controlling [O:\CISRA\STAR\MASTERIMSTRV I HMXL 107 Y communication on the various Bus interfaces. The pixel organizer control unit outputs diagnostic information as required to the miscellaneous module 239 according to its status register settings.

Turning now to Fig. 109, there is illustrated the operand fetch unit 802 of Fig. 108 in more detail. The operand fetch unit 802 includes an Instruction Bus address generator (lAG) 810 which contains a state machine for generating requests to fetch operand data. These requests are sent to a request arbiter 811 which arbitrates between requests from the address generator 810 and those from the MUV address generator 805 (Fig. 108) and sends the winning requests to the input (MAG) interface switch 252. The request arbiter 811 contains a state machine to handle requests. It monitors the state of the FIFO via FIFO count unit 814 to decide when it should dispatch the next request. A byte enable generator 812 takes information on the IAG 810 and generates byte enable patterns 816 specifying the valid bytes within each operand data word returned by the input interface switch 252. The byte enabled pattern is stored along with the associated operand data in the FIFO. The request arbiter 811 handles MAG requests before lAG requests when both requests arrive at the same time.

Returning to Fig. 108. the MUV address generator 805 operates in a number *ooeo of different modes. A first of these modes is the JPEG (compression) mode. In this mode, input data for JPEG compression is supplied by the data manipulation units 804 with the MUV buffer 250 being utilized as a double buffer. The MUV RAM 250 address generator 805 is responsible for generating the right addresses to the MUV buffer to store incoming data processed by the data manipulation unit 804. The MAG 805 is also responsible for generating read addresses to retrieve color component data from the stored pixels to form 8 x 8 blocks for JPEG compression. The MAG 805 is also responsible for dealing with the situation when a MCU lies partially on the image.

In Fig. 110, there is illustrated an example of a padding operation carried out by the MAG 805.

For normal pixel data, the MAG 805 stores the four color components at the same address within the MUV RAM 250 in four 8 bit rams. To facilitate retrieval of data from the same color channel simultaneously, the MCU data is barrel shifted to the left before it is stored in the MUV RAM 250. The number of bytes the data is shifted to the left is determined by the lowest two bits of the write address. For example, in Fig. 111 there is illustrated the data organization within the MUV RAM 250 for 32 bit pixel data when no sub-sampling is needed. Sub-sampling of input data maybe selected for three or four channel interleaved JPEG mode. In multichannel JPEG compression mode with subsampling operating, the MAG 805 (Fig. 108) performs the sub-sampling before the 32 bit data is stored in the MUV RAM 250 for optimal JPEG coder performance. For the first four incoming pixels, only the first and fourth channels stored in the MUV RAM 250 contains useful data. The data in the second and third [O:\CISRA\STAR\MASTER JMSTRV I HMXL 108 channel is sub-sampled and stored in a register inside the pixel organizer 246. For the next four incoming pixels. the second and third channel are filled with sub-sampled data. In Fig. 112, there is illustrated an example of MCU data organization for multichannel sub-sampling mode. The MAG treats all single channel unpacked data exactly the same as multi-channel pixel data. An example of single channel packed data as read from the MUV RAM is illustrated in Fig. 113.

While the writing process is storing an incoming MCU into the MUV RAM, the reading process is reading 8 x 8 blocks out of the MUV RAM. In general, the blocks are generated by the MAG 805 by reading the data for each channel sequentially, four co-efficients at the time. For pixel data and unpacked input data, the stored data is organized as illustrated in Fig. 111. Therefore, to compose one 8 x 8 block of non-sampled pixel data, the reading process reads data diagonally from the MUV RAM. An example of this process is illustrated in Fig. 114, which shows the reading sequence for four channel data, the form of storage in the MUV RAM 250 I" assisting to read multiple values for the same channel simultaneously.

When operating in color conversion mode, the MUV RAM 250 is used as a cache to hold the interval and fractional values and the MAG 805 operates as a cache controller. The MUV RAM 250 caches values for three color channels with each color channel containing 256 pairs of four bit interval and fractional values. For each pixel output via the DMU, the MAG 805 is utilized to get the values from the MUV RAM 250. Where the value is not available, the MAG 805 generates a memory read request to fetch the missing interval and fractional values. Instead of fetching one entry in each request, multiple entries are fetched simultaneously for better utilization of bandwidth.

For image transformation and convolution, the MUV RAM 250 stores the matrix co-efficients for the MDP. The MAG cycles through all the matrix co-efficient stored in the MUV RAM 250. At the start of an image transformation and convolution instruction, the MAG 805 generates a request to the operand fetch unit to fetch the kernal description "header" (Fig. 94) and the first matrix co-efficient in a burst request.

Turning now to Fig. 115, there is illustrated the MUV address generator (MAG) 805 of Fig. 108 in more detail. The MAG 805 includes an IBus request module 820 which multiplexers IBus requests generated by an image transformation controller (ITX) 821 and a color space conversion (CSC) controller 822. The requests are sent to the operand fetch unit which services the request. The pixel organizer 246 is only operated either in image transformation or color space conversion mode.

Hence, there is no arbitration required between the two controllers 821, 822. The IBus request module 820 derives the information for generating a request to the operand fetch unit including the burst address and burst length from the relevant pixel organizer registers.

[O:\CISRA\STAR\MASTERIMSTRV I HMXL 109 A JPEG controller 824 is utilized when operating in JPEG mode and comprizes two state machines being a JPEG write controller and a JPEG read controller. The two controllers operate simultaneously and synchronize with each other through the use of internal registers.

In a JPEG compression operation, the DMU outputs the MCU data which is stored into the MUV RAM. The JPEG Write Controller is responsible for horizontal padding and control of pixel subsampling, while the JPEG Read Controller is responsible for vertical padding. Horizontal padding is achieved by stalling the DMU output, and vertical padding is achieved by reading the previously read 8x8 block line.

The JPEG Write Controller keeps track of the position of the current MCU and DMU output pixel on the source image, and uses this information to decide when the DMU has to be stalled for horizontal padding. When a MCU has been written into the MUV RAM 250, the JPEG Write Controller sets/resets a set of internal registers e ge which indicates the MCU is on the right edge of the image, or is at the bottom edge of the image. The JPEG Read Controller then uses the content of these registers to decide if it is required to perform verical padding, and if it has read the last MCU on the image.

The JPEG Write Controller keeps track of DMU output data, and stores the DMU output data into the MUV RAM 250.

The controller uses a set of registers to record the current position of the input pixel. This information is used to perform horizontally padding by stalling the DMU output.

When a complete MCU has been written into the MUV RAM 250, the controller writes the MCU information into JPEG-RW-IPC registers which is later used by the JPEG Read Controller.

The controller enters the SLEEP state after the last MCU has been written into the MUV RAM 250. The controller stays in this state until the current instruction completes.

The JPEG Read Controller read the 8x8 blocks from the MCUs stored in the MUV RAM 250. For multi-channel pixels, the controller reads the MCU several times, each time extracting a different byte from each pixel stored in the MUV RAM.

The controller detects if it needs to perform vertical padding using the information provided by the JPEG-RW-IPC. Vertical padding is achieved by rereading the last 8-bytes read from the MUV RAM 250.

The Image Transformation Controller 821 is responsible for reading the kernel discriptor from the IBus and passes the kernel header to the MDP 242, and cycles through the matrix co-efficients as many times as specified in the po.len register. All data output by the PO 246 in an image transformation and Convolution instruction are fetched directly from the IBus and not passed through the DMU.

(O:\CISRA\STAR\MASTERIMSTRVI H1MXI 110 O The top eight bits of the first matrix co-efficient fetched immediately after the kernel header contains the number of remaining matrix co-efficients to be fetched.

The kernel header is passed to the MDP directly without modifications, whilst the matrix co-efficients are sign extended before they are passed to the MDP.

SThe pixel sub-sampler 825 comprizes two identical channel sub-samplers,. each operating on a byte from the input word. When the relevant configuration register is not asserted, the pixel sub-sampler copies its input to its output. When the configuration register is asserted, the sub-sampler sub-samples the input data either by taking the average or by decimation.

An MUV multiplexer module 826 selects the MUV read and write signals from the currently active controller. Internal multiplexers are used to select the read addresses output via the various controllers that utilize the MUV RAM 250. An MUV RAM write address is held in an 8 bit register in an MUV multiplexer module. The controllers utilising the MUV RAM 250, load the write address register in addition to providing control for determining a next MUV RAM address.

A MUV valid access module 827 is utilized by the color space conversion controller to determine if the interval and fractional values for a current pixel output by .oo..i S"the data manipulation unit is available in the MUV RAM 250. When one or more color channels are missing, the NMUV valid access module 827 passes the relevant address to the IBus request module 820 for loading in burst mode, interval and fractional values.

Upon servicing a cache miss, the MUV valid access module 827 sets internal validity bits which map the set of interval and fractional values fetched so far.

A replicate module 829 replicates the incoming data, the number of times as specified by an internal pixel register. The input stream is stalled while the replication module is replicating the current input word. A PBus interface module 630 is utilized to re-time the output signals of the pixel organizer 246 to the main data path 242 and JPEG coder 241 and vice versa. Finally, a MAG controller 831 generates signals for initiating and shutting down the various sub-modules. It also performs multiplexing of incoming PBus signals from the main data path 242 and JPEG coder 241.

3.18.2 MUV Buffer Returning to Fig. 2. it will be evident from the foregoing discussion that the pixel organizer 246 interacts with the MUV buffer 250.

The reconfigurable MUV buffer 250 is able to support a number of operating modes including the single lookup table mode (mode0), multiple lookup table mode (model), and JPEG mode (mode2). A different type of data object is stored in the buffer in each mode. For instance, the data objects that are stored in the buffer can be data words, values of a multiplicity of lookup tables, single channel data and multiple channel pixel data. In general, the data objects can have different sizes. Furthermore, IO:\CISRA\STAR\MASTERIMSTRV I ItMXI.

111 9 the data objects stored in the reconfigurable MUV buffer 250 can be accessed in substantially different ways which is dependent on the operating mode of the buffer.

To facilitate the different methods needed to store and retrieve different types of data objects, the data objects are often encoded before they are stored. The coding scheme applied to a data object is determined by the size of the data object, the format that the data objects are to be presented, how the data objects are retrieved from the buffer, and also the organization of the memory modules that comprize the buffer.

Fig. 116 is a block diagram of the components used to implement the reconfigurable MUV buffer 250. The reconfigurable MUV buffer 250 comprizes an encoder 1290, a storage device 1293, a decoder 1291, and a read address and rotate signal generator 1292. When a data object arrives from an input data stream 1295, the data object may be encoded into an internal data format and placed on the encoded input data stream 1296 by the encoder 1290. The encoded data object is stored in the .o storage device 1293.

When decoding previously stored data objects, an encoded data object is read out of the storage device via encoded output data stream 1297. The encoded data object in the encoded output data stream 1297 is decoded by a decoder 1291. The decoded data object. is then presented at the output data stream 1298.

The write addresses 1305 to the storage device 1293 are provided by the MAG 805 (Fig 108). The read addresses 1299, 1300 and 1301 are also provided by the MAG 805 (Fig 108), and translated and multiplexed to the storage device 1293 by the Read Address and Rotate Signal Generator 1292, which also generates input and output rotate control signals 1303 and 1304 to the encoder and decoder respectively. The write enable signals 1306 and 1307 are provided by an external source. An operating mode signal 1302, which is provided by means of the controller 801(Fig 108), is connected to the encoder 1290, the decoder 1291, the Read Address and Rotate Signal Generator 1292, and the storage device 1293. An increment signal 1308 increments internal counter(s) in the read address and rotate signal generator and may be utilized in JPEG mode (mode2).

Preferably, when the reconfigurable MUV buffer 250 is operating in the single lookup table mode (modeO). the buffer behaves substantially like a single memory module. Data objects may be stored into and retrieved from the buffer in substantially the same way used to access memory modules.

When the reconfigurable MUV buffer 250 is operating in the multiple lookup table mode (mode the buffer 250 is divided into a plurality of tables with up to three lookup tables may be stored in the storage device 1293. The lookup tables may be accessed separately and simultaneously. For instance, in one example, interval and fraction values are stored in the storage device 1293 in the multiple lookup table mode, and the tables are indexed utilizing the lower three bytes of the input data stream 1295.

[O:\CISRASTAR\MASTERIMSTRV I HMXL 112 9 Each of the three bytes are issued to access a separate lookup table stored in the storage device 1293.

When an image undergoes JPEG compression, the image is converted into an encoded data stream. The pixels are retrieved in the form of MCUs from the original image. The MCUs are read from left to right, and top to bottom from the image. -Each MCU is decomposed into a number of single component 8x8 blocks. The number of 8x8 blocks that can be extracted from a MCU depends on several factors including: the number of color components in the source pixels. and for a multiple channel JPEG mode, whether subsampling is needed. The 8x8 blocks are then subjected to forward DCT (FDCT), quantization, and entropy encoding. In the case of JPEG decompression, the encoded data are read sequentially from a data stream. The data stream undergoes entropy decoding, dequantization and inverse DCT (IDCT). The output of the IDCT operation are 8x8 blocks. A number of single component 8x8 blocks are combined to reconstruct a MCU. As with JPEG compression, the number of single component 8x8 blocks are dependent on the same factors mentioned above. The reconfigurable MUV buffer 250 may be used in the process to decompose MCUs into a multiplicity of single component 8x8 blocks, to reconstruct MCUs from a multiplicity S"of single component 8x8 blocks.

When the reconfigurable MUV buffer 250 is operating in JPEG mode •g 20 (mode2), the input data stream 1295 to the buffer 250 comprizes pixels for a JPEG compression operation, or single component data in a JPEG decompression operation.

The output data stream 1298 of the buffer 250 comprizes single channel data blocks for o• a JPEG compression operation, or pixel data in a JPEG decompression operation. In this example, for a JPEG compression operation, an input pixel may comprize up to four channels denoted Y, U. V and 0. When the required number of pixels have been accumulated in the buffer to form a complete pixel block, the extraction of single component data blocks can commence. Each single component data block comprizes data from the like channel of each pixel stored in the buffer. Thus in this example, up to four single component data blocks may be extracted from one pixel data block. In this embodiment, when the reconfigurable MUV buffer 250 is operating in the JPEG mode (mode2) for JPEG compression, a multiplicity of Minimum Coded Units (MCUs) each containing 64 single or 64 multiple channel pixels may be stored in the buffer, and a multiplicity of 64-byte long single channel component data blocks are extracted from each MCU stored in the buffer. In this embodiment, for the buffer 1289 operating in the JPEG mode (mode2) for a JPEG decompression operations, the output data stream contains output pixels that have up to four components Y, U, V and 0. When the required number of complete single component data blocks have been written into the buffer, the extraction of pixel data may commence. A byte from up to four single IO:\CISRA\STAR\MASTER]MSTRVI

HMXL

113 9component block corresponding to different color components are retrieved to form an output pixel.

Fig. 117 illustrates the encoder 1290 of Fig. 116 in more detail. For the pixel block decomposition mode only, each input data object is encoded using a byte-wize rotation before it is stored into the storage device 1293 (Fig. 129). The amount of rotation is specified by the input rotate control signal 1303. As the pixel data has a maximum of four bytes in this example, a 32-bit 4-to-I multiplexer 1320 and output 1325 is used to select one of the four possible rotated versions of the input pixel. For example, if the four bytes in a pixel are labelled the four possible rotated versions of this pixel are and The four encoded bytes are output 1296 for storage in the storage device.

When the buffer is placed in an operating mode other than the JPEG mode (mode2), for example, single lookup table mode (modeO) and multiple lookup table mode (model), byte-wize rotation may not be necessary and may not be performed on the input data objects. The input data object is prevented from being rotated in the latter cases by overriding the input rotate control signal with a no-operation value. This value 1323 can be zero. A 2-to-i multiplexer 1321 produces control signals 1326 by selecting between the input rotate control signal 1303 and the no-operation value 1323.

The current operating mode 1302 is compared with the value assigned to the pixel block decomposition mode to produce the multiplexer select signal 1322. The 4-to-1 multiplexer 1320, which is controlled by signal 1326 selects one of the four rotated version of the input data object on the input data stream 1325, and produces an encoded input data object on the encoded input data stream 1326.

Fig. 118 illustrates a schematic of a combinatorial circuit which implements the decoder 1291 for the decoding of the encoded output data stream 1297. The decoder 1321 operates in a substantially similar manner to the encoder. The decoder only operates on the data when the data buffer is in the JPEG mode (mode2). The lower 32-bit of an encoded output data object in the encoded output data stream 1297 is passed to the decoder. The data is decoded using a byte-wize rotation with an opposite sense of rotation to the rotation performed by the encoder 1290. A 32-bit 4-to-1 multiplexer 1330 is used to select one of the four possible rotated version of the encoded data. For example. if the four bytes in an input pixel are labelled the four possible rotated version of this pixel are and The output rotate control signal 1304 is utilized only when the buffer is in a pixel block decomposition mode, and when overridden by a no-operation value in other operating modes. The no-operation value utilized 1333 is zero. A 2-to-I multiplexer 1331 produces signal 1334 by selecting selects between the output rotate control signal 1304 and the no-operation value 1333. The current operating mode 1302 is compared with the value assigned to the pixel block decomposition mode to produce the [O:\CISRA\STAR\MASTERJMSTRVI HMXL 114 multiplexer select signal 1332. The 4-to-1 multiplexer 1330, which is controlled by signal 1334, selects one of the four rotated version of the encoded output data object on the encoded output data stream 1297, and produces an output data object on the output data stream 1298.

Returning to Fig. 116, the method of internal read address generation used by the circuit is selected by the operating mode 1302 of the reconfigurable MUV buffer 250. For the single lookup table mode (mode0) and multiple lookup table mode (model), the read addresses are provided by the MAG 805 (Fig 108) in the form of external read addresses 1299, 1300, and 1301. For the single lookup table mode (mode0), the memory modules 1380, 1381, 1382, 1383, 1384 and 1385 (Fig. 121) of the storage device 1293 operate together. The read address and the write address supplied to the memory modules 1380 to 1385 (Fig. 121) are substantially the same.

Hence the storage device 1293 only needs the external circuits to supply one read *o o address and one write address, and uses internal logic to multiplex these addresses to the memory modules 1380 to 1385 (Fig. 121). For mode0, the read address is supplied by the external read address 1299 (Fig. 116) and is multiplexed to the internal read address 1348 (Fig. 121) without substantial changes. The external read addresses 1300 ooooo S• and 1301 (Fig. 116), and the internal read addresses 1349, 1350 and 1351 (Fig. 121), are not used in mode0. The write address is supplied by the external write address 1305 (Fig. 116), and is connected to the write address of each memory module 1380 to 1385 (Fig. 121) without substantial modification.

In this example, a design that provides three lookup tables in the multiple o• lookup table mode (mode 1) is presented. The encoded input data is written simultaneously into all memory modules 1380 to 1385 (Fig. 121), while the three tables 25 are accessed independently, and thus require one index to each of the three tables.

*oo Three indices, that is, read addresses to the memory modules 1380 to 1385 (Fig. 121), are supplied to the storage device 1293. These read addresses are multiplexed to the appropriate memory modules 1380 to 1385 using internal logic. In substantially the same manner as in the single lookup table mode, the write address supplied externally is connected to the write address of each of the memory modules 1380 to 1385 without substantial modifications. Hence, for the multiple lookup table mode (mode the external read addresses 1299, 1300 and 1311 are multiplexed to internal read addresses 1348, 1349 and 1350 respectively. The internal read address 1351 is not used in mode 1. The method of generating the internal read addresses need in the JPEG mode (mode 2) is different to the method described above.

Fig. 119 illustrates a schematic of a combinatorial circuit which implements the read address and rotate control signals generation circuit 1292 (Fig. 116), for the reconfigurable data buffer operating in the JPEG mode (mode 2) for JPEG compression. In the JPEG mode (mode the generator 1292 uses the output of a rO:\CISRA\STAR\MASTERIMSTRV I- HMXL 115component block counter 1340 and the output of a data byte counter 1341 to compute the internal read addresses to the memory modules comprising the storage device 1293.

The component block counter 1340 gives the number of component blocks extracted from a pixel data block, which is stored in the storage device. The number of like Scomponents extracted from the pixel data block is given by multiplying the output of the data byte counter 1341 by four. In this embodiment, an internal read address 1348, 1349, 1350 or 1351 for the pixel data block decomposition mode is computed as follows. The output of the component block counter is used to generate an offset value 1343, 1344, 1345, 1346 or 1347, and the output of the data byte counter 1341 is used to generate a base read address 1354. The offset value 1343 is added 1358 to the base read address 1354 and the sum is an internal read address 1348 (or 1349, 1350 or 1351). The offset values for the memory modules are in general different for simultaneous read operations performed on multiple memory modules, but the offset S- value to each memory module is in general substantially the same during the extraction "15 of one component data block. The base addresses 1354 used to compute the four internal read addresses in the pixel data block decomposition mode are substantially the same. The increment signal 1308 is used as the component byte counter increment oo• *signal. The counter is incremented after every successful read operation has been performed. A component block counter increment signal 1356 is used to increment the component block counter 1340, after a complete single component data block has been retrieved from the buffer.

The output rotate control signal 1304 (Fig. 116) is derived from the output of -*the component block counter, and the output of the data byte counter, in substantially similar manner to the generation of an internal read address. The output of the component block counter is used to compute a rotation offset 1347. The output rotate control signal 1304 is given by the lowest two bits of the sum of the base read address 1354 and the rotation offset 1355. The input rotate control signal 1303 is simply given by the lowest two bytes of the external write addresses 1305 in this example of the address and rotate control signals generator.

Fig. 120 shows another example of the address generator 1292 for reassembling multiple channel pixel data from single component data stored in the reconfigurable MUV buffer 250. In this case, the buffer is operating in the JPEG (mode2) for JPEG decompression operation. In this case, single component data blocks are stored in the buffer, and pixel data blocks are retrieved from the buffer. In this example, the write address to the memory modules are provided by the external write address 1305 without substantial changes. The single component blocks are stored in contiguous memory locations. The input rotate control signal 1303 in this example is simply set to the lowest two bits of the write address. A pixel counter 1360 is used to keep track of the number of pixels extracted from the single component blocks stored in [O:\CISRA\STAR\MASTERIMSTRVI HMXL 116 9 the buffer. The output of the pixel counter is used to generate the read addresses 1348, 1349. 1350 and 1351, and the output rotate control signal 1304. The read addresses are in general different for each memory module that comprize the storage device 1293.

In this example, a read address comprizes two parts, a single component block index 1362, 1363, 1364 or 1365. and a byte index 1361. An offset is added to bit 3 and 4 of the output of the pixel counter to calculate the single component block index for a particular block. The offsets 1366, 1367, 1368 and 1369 are in general different for each read address. Bit 2 to bit 0 of the output of the pixel counter are used as the byte index 1361 of a read address. A read address is the result of the concatenation of a single component block index 1362, 1363, 1364 or 1365 and a byte index 1361, as illustrated in Fig. 120. In this example, the output rotate control signal 1304 is generated using bit 4 and bit 3 of the output of the pixel counter without substantial change. The increment signal 1308 is used as the pixel counter increment signal to o* o increment the pixel counter 1360. The pixel counter 1360 is incremented after a pixel 5 has been successfully retrieved from the buffer.

Fig. 121 illustrates an example of a structure of the storage device 1293. The storage device 1293 can comprize three 4-bit wide memory modules 1383, 1384 and ee.ooi S•1385, and three 8-bit wide memory modules 1380, 1381 and 1382. The memory modules can be combined together to store 36-bit words in the single lookup table mode (mode0), 3x12-bit words in the multiple lookup table mode (model), and 32-bit pixels or 4x8-bit single component data in JPEG mode (mode2). Typically each memory module is associated with a different part of the encoded input and output data streams •"(1296 and 1297). For example, memory module 1380 has its data input port connected to bit 0 to bit 7 of the encoded input data stream 1296, and its data output port connected to bit 0 to bit 7 of the encoded output data stream 1297. In this example, the write addresses to all the memory modules are connected together, and share substantially the same value. In contrast, the read addresses 1386, 1387, 1388, 1389, 1390 and 1391 to the memory modules of the example illustrated in Fig. 121 are supplied by the read address generator 1292, and are in general different. In the example, a common write enable signal is used to provide the write enable signals to all three 8-bit memory modules, and a second common write enable signal is used to provide the write enable signals to all three 4-bit memory modules.

Fig. 122 illustrates a schematic of a combinatorial circuit used for generating read addresses 1386, 1387. 1388, 1389, 1390 and 1391 for accessing to the memory modules contained in a storage device 1293. Each encoded input data object is broken up into parts, and each part is stored into a separate memory module in the storage device. Hence, typically the write addresses to all memory modules for all operating modes are substantially the same and thus substantially no logic is required to compute the write address to the memory modules. The read addresses in this example, on the IO:\CISRA\STAR\MASTERIMSTRVI H MXL 117 other hand, are typically different for different operations, and are also different to each memory module within each operating mode. All bytes in the output data stream 1298 of the reconfigurable MUV buffer 250 must contain single component data extracted from the pixel data stored in the buffer in the JPEG mode (mode2) for JPEG compression, or pixel data extracted from the single component data blocks stored in the buffer in the JPEG mode for JPEG decomposition. The requirements on the output data stream are achieved by providing four read addresses 1348, 1349, 1350 and 1351 to the buffer. In the multiple lookup table mode (model), up to three lookup tables are stored in the buffer, and thus only up to three read addresses 1348, 1349 and 1350 are needed to index the three lookup tables. The read addresses to all memory modules are substantially the same in the single lookup table mode (mode0), and only read address 248 is used in this mode. The example controller circuit shown in Fig. 122 uses the operating mode signals to the buffer, and up to four read addresses, to compute the read address 1386 1391 to each of the six memory modules comprising the storage i" device 1293. The read address generator 1292 takes, as its inputs, the external read addresses 1299, which comprizes external address buses 1348, 1349, 1350 and 1351, and generates the internal read addresses 1386, 1387, 1388, 1389, 1390 and 1391 to the memory modules that comprize the storage device 1293. No manipulation on the external write addresses 1305 is required in the operation of this example.

'@20 Fig. 123 illustrates a representation of an example of how 20-bit matrix coefficients may be stored in the buffer 250 when the buffer 250 is operating in single lookup table mode (mode0. In this example, typically no encoding is applied on the data objects stored in the cache when the data objects are written into the reconfigurable MUV buffer. The matrix coefficients are stored in the 8-bit memory modules 1380, 1381 and 1382. Bit 7 to bit 0 of the matrix coefficient are stored in memory module 1380, bit 15 to bit 8 of the matrix coefficient are stored in memory module 1381, and bit 19 to bit 16 of the matrix coefficient are stored in the lower 4 bits of memory module 1382. The data objects stored in the buffer may be retrieved as many times as required for the rest of the instruction. The write and read addresses to all memory modules involved in the single lookup table mode are substantially the same.

Fig. 124 illustrates a representation of how the table entries are stored in the buffer in the multiple lookup table mode (model). In this example, up to three lookup tables may be stored in the buffer, and each lookup table entry comprizes a 4-bit interval value and an 8-bit fraction value. Typically the interval values are stored in the 4-bit memory modules, and the fraction values are stored in the 8-bit memory modules.

The three lookup tables 1410, 1411 and 1412 are stored in the memory banks 1380 and 1383, 1381 and 1384, 1382 and 1385 in the example. The separate write enable control signals 1306 and 1307 (Fig. 121) allow the interval values to be written into the storage device 1293 without affecting the fraction values already stored in the storage [O:\CISRA\STAR\MASTER]MSTRV I HMXL 118 device. In substantially the same manner, the fraction values may be written into storage device without affecting the interval values already stored in the storage device.

Fig. 125 illustrates a representation of how pixel data is stored in the reconfigurable MUV buffer 250 when the JPEG mode (mode2) for decomposing pixel S data blocks into single component data blocks. The storage device 1293 is organized as four 8-bit memory banks, which comprizes the memory modules 1380, 1381, 1382, 1383 and 1384, with 1383 and 1384 used together to operate substantially in the same manner as an 8-bit memory module. Memory module 1385 is not used in the JPEG mode (mode2). A 32-bit encoded pixel is broken up into four bytes, and each is stored into a different 8-bit memory module.

Fig. 126 illustrates a representation of how the single component data blocks are stored in the storage device 1293 in single component mode. The storage device 1293 is organized as four 8-bit memory banks, which comprizes the memory modules 1380, 1381, 1382, 1383 and 1384, with 1383 and 1384 used together to operate I15 substantially in the same manner as an 8-bit memory module. A single component block in this example comprizes 64 bytes. A different amount of byte rotation can be applied to each single component block when it is written into the buffer. A 32-bit encoded pixel data is retrieved by reading from the different single component data block stored in the buffer.

20 For further details on the organization of the data within the MUV buffer 250 reference is made herein to the section entitled Pixel Organizer.

This preferred embodiment has shown that a reconfigurable data buffer may be used to handle data involved in different instructions. A reconfigurable data buffer that provides three operating modes has been disclosed. Different address generation techniques may be needed in each operating mode of the buffer. The single look-up table mode (modeO) may be used to store matrix coefficients in the buffer for an image *9* transformation operation. The multiple look-up table mode (model) may be used to store a multiplicity of interval and fraction lookup tables in the buffer in a multiple channel color space conversion (CSC) operation. The JPEG mode (mode2) may be used either to decompose MCU data into single component 8x8 blocks, or to reconstruct MCU data from single-component 8x8 blocks, in JPEG compression and decompression operation respectively.

3.18.3 Result Organizer The MUV buffer 250 is also utilized by the result organizer 249. The result organizer 249 buffers and formats the data stream from either the main data path 242 or the JPEG coder 241. The result organizer 249 also is responsible for data packing and unpacking, denormalization. byte lane swapping and realignment of result data as previously discussed with reference to Fig. 42. Additionally the result organizer 249 I HMXL 119 9 transmits its results to the external interface controller 238, the local memory controller 236, and the peripheral interface controller 237 as required.

When operating in JPEG decompression mode, the results organizer 249 utilizes the MUV RAM 250 to double buffer image data produced by the JPEG coder 241. Double buffering increases the performance of the JPEG decompression by allowing data from the JPEG coder 241 to be written to one half of the MUV RAM 250 w'hile at the same time image data presently in the other half of the MUV RAM 250 is output to a desired destination.

The 1, 3 and 4 channel image data is passed to the result organizer 249 during JPEG decompression in a form of 8 x 8 blocks with each block consisting of 8 bit components from the same channel. The result organizer stores these blocks in the MUV RAM 250 in the order provided and then, for multi-channel interleaved images, meshing of the channels in performed when reading data from the MUV RAM 250.

For example, in a three channel JPEG compression based on Y, U, V color space, the o: 15 JPEG coder 241 outputs three 8 x 8 blocks, the first consisting of Y components, the second made of the U components and the third made up of the V components.

Meshing is accomplished by taking one component from each block and constructing the pixel in the form of (YUVX) where X represents an unused channel. Byte swapping may be applied to each output to swap the channels as desired. The result organizer 249 must also do any required sub-sampling to reconstruct chroma-data from decompressed output. This can involve replicating each program channel to produce S and an one.

Turning to Fig. 127, there is illustrated the result organizer 249 of Fig. 2 in S' more detail. The result organizer 249 is based around the usual standard CBus 25 interface 840 which includes a register file of registers to be set for operation of the result organizer 249. The operation of the result organizer 249 is similar to that of the pixel organizer 246, however the reverse data manipulation operations take place. A data manipulation unit 842 performs byte lane swapping, component substitution, component deselection and denormalization operations on data provided by the MUV address generator (MAG) 805. The operations carried out are those previously described with reference to Fig. 42 and operate in accordance with various fields set in internal registers. The FIFO queue 843 provides buffering of output data before it is output via RBus control unit 844.

The RBus control unit 844 is composed of an address decoder and state machines for address generation. The address for the destination module is stored in an internal register in addition to data on the number of output bytes required. Further, an internal RO CUT register specifies how many output bytes to discard before sending a byte stream on the output bus. Additionally, a RO_LMT register specifies the maximum number of data items to be output with subsequent data bytes after the output [O:\CISRA\STAR\MASTERIMSTRV II IMXL 120 limit being ignored. The MAG 805 generates addresses for the MUV RAM 250 during SJPEG decompression. The MUV RAM 250 is utilized to double buffer output from the JPEG decoder. The MAG 805 performs any appropriate meshing of components in the MUV RAM 250 in accordance with an internal configuration register and outputs single channel, three channel or four channel interleaved pixels. The data obtained from the MUV RAM 250 is then passed through the data manipulation unit 842, since byte lane swapping may need to be applied before pixel data is sent to the appropriate destination. When the results organizer 249 is not configured for JPEG mode, the MAG 805 simply forwards data from the PBus receiver 845 straight through to the data manipulation unit 842.

3.18.4 Operand Organizers B and C S"Returning again to Fig. 2, the two identical operand organizers 247, 248 perform the function of buffering data from the data cache control 240 and forwarding the data to the JPEG coder 241 or the main data path 242. The operand organizers °15 247, 248 are operated in a number of modes: Idle mode wherein the operand organizer only responds to CBus requests.

Immediate mode when the data of the current instruction is stored in an S internal register of the operand organizer.

Sequential mode wherein the operator organizer generates sequential :addresses and requests data from the data cache controller 240 whenever its input S buffer requires filling.

A number of modes of operation of the main data path 242 require at least one of the operand organizers 247, 248 to operate in sequential mode. These modes include compositing wherein operand organizer B 247 is required to buffer pixels which are to be composited with another image. Operand organizer C 248 is used for compositing operations for attenuation of values for each data channel. In halftoning mode, operand organizer B 247 buffers 8 bit matrix co-efficients and in hierarchial image format decompression mode the operand organizer B 247 buffers data for both vertical interpolation and residual merging instructions.

In constant mode, an operand organizer B constructs a single internal data word and replicates this word a number of times as given by an internal register.

In tiling mode an operand organizer B buffers data that comprizes a pixel tile.

In random mode the operand organizer forwards addresses from the MDP 242 or JPEG coder 241 directly to the data cache controller. These addresses are utilized to index the data cache 230.

An internal length register specifies the number of items to be generated by individual operand organizers 247, 248 when operated in sequential/titling/constant IO:\CISRA\STAR\M AvTFR I KM TD D, I I tA VI 121 mode. Each operand organizer 247, 248 keeps account of the number of data items processed so far and stops when the count reaches the value specified in its internal register. Each operand organizer is further responsible for formatting input data via byte lane swapping, component substitution, packed/unpacked and normalization functions. The desired operations are configured utilising internal registers. Further, each operand organizer 247. 248 may also be configured to constrict data items.

Turning now to Fig. 128, there is illustrated the structure of operand organizers (247, 248) in more detail. The operand organizer 247, 248 includes the usual standard CBus interface and registers 850 responsible for the overall control of the operand organizer. Further, an OBus control unit 851 is provided for connection to the data cache controller 240 and is responsible for performing address generation for sequential/tile/ constant modes, generating control signals to enable communications on the OBus interface to each operand organizer 247, 248 and controlling data manipulation unit operations such as normalization and replication, that require the state 15 to be saved from previous clock cycles of the input stream. When an operand organizer 247, 248 is operating in sequential or tiling mode, the OBus control unit 851 sends requests for data to the data cache controller 240, the addresses being determined by internal registers.

Each operand organizer further contains a 36 bit wide FIFO buffer 852 used to buffer data from the data cache controller 240 in various modes of operation.

A data manipulation unit 853 performs the same functions as the corresponding S"data manipulation unit 804 of the pixel organizer 246.

A main data path/JPEG coder interface 854 multiplexer address and data to and from the main data path and JPEG coder modules 242, 241 in normal operating 25 mode. The MDP/JC interface 854 passes input data from the data manipulation units 853 to the main data path and in the process may be configured to replicate this data.

When operating in color conversion mode, the units 851, 854 are bypassed in order to ensure high speed access to the data cache controller 240 and the color conversion tables.

3.18.5 Main Data Path Unit The aspects of the following embodiment relate to an image processor providing a low cost computer architecture capable of performing a number of image processing operations at high speed. Still further, the image processor seeks to provide a flexible computer architecture capable of being configured to perform image processing 3 operations that are not originally specified. The image processor also seeks to provide a computer architecture having a large amount of identical logic, which simplifies the design process and lowers the cost of designing such an architecture.

The computer architecture comprises a control register block, a decoding block, a data object processor, and flow control logic. The control register block stores all the 1O:\CISRA\STAR\MASTERIMSTRV I HMXL

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122 relevant information about the image processing operation. The decoding block decodes the information into configuration signals. which configure an input data object interface. The input data object interface accepts and stores data objects from outside, and distributes these data objects to the data object processor. For some image processing operations, the input data object interface may also generate addresses for data objects, so that the source of these data objects can provide the correct data objects. The data object processor performs arithmetic operations on the data objects received. The flow control logic controls the flow of data objects within the data object processing logic.

More particularly, the data object processor can comprise a number of identical data object sub-processors. each of which processes part of an incoming data object.

The data object sub-processor includes a number of identical multifunctional arithmetic oe units that perform arithmetic operations on these parts of data objects, post processing logic that processes the outgoing data objects, and multiplexer logic that connects the _i 15 multifunctional arithmetic units and the post-processing unit together. The multifunctional arithmetic units contain storage for parts of the calculated data objects.

The storage is enabled or disabled by the flow control logic. The multifunctional arithmetic units and multiplexer logic are configured by the configuration signals generated by the decoding logic.

Furthermore, the configuration signals from the decoding logic can be overridden by an external programming agent. Through this mechanism any multifunctional blocks and multiplexer logic can be individually configured by an external programming agent, allowing it to configure the image processor to perform image processing operations that are not specified beforehand. These and other aspects of the embodiments of the invention are described in greater detail hereinafter.

Returning to Fig. 2. as noted previously the main data path unit 242 performs all data manipulation operations and instructions other than JPEG data coding. These instructions include compositing, color space conversion, image transformations, convolution, matrix multiplication, halftoning, memory copying and hierarchial image format decompression. The main data path 242 receives pixel and operand data from the pixel organizer 246, and operand organizers 247, 248 and feeds the resultant output to the result organizer 249.

Fig.129 illustrates a block diagram of the main data path unit 242. The main data path unit 242 is a general image processor and includes input interface 1460, image data processor 1462. instruction word register 1464, instruction word decoder 1468, control signal register 1470, register file 1472, and a ROM 1475.

The instruction controller 235 transfers instruction words to the instruction word register 1464 via bus 1454. Each instruction word contains information such as the kind of image processing operation to be executed, and flags to enable or disable [O:\CISRA\STAR\W ASTERIMSTRV I HIXL 123 various options in that image processing operation. The instruction word is then transferred to the instruction word decoder 1468 via bus 1465. Instruction controller 235 can then indicate to the instruction word decoder 1468 to decode the instruction word. Upon receiving that indication, the instruction decoder 1468 decodes the instruction word into control signals. These control signals are then transferred via bus 1469 to the control signal register 1470. The output of the control signal register is then connected to the input interface 1460 and image data processor 1462 via bus 1471.

To add further flexibility to the main data path unit 242, the instruction controller 235 can also write into the control signal register 1470. This allows anyone who is familiar with the structure of the main data path unit 242 to micro-configure the main data path unit 242 so that the main data path unit 242 will execute image processing operations that are not be described by any instruction word.

In cases when all the necessary information to perform the desired image processing operation does not fit into the instruction word, the instruction controller 15 235 can write all the other information necessary to perform the desired image i processing operation into some of the selected registers in register file 1472. The information is then transferred to the input interface 1460 and the image data processor 1462 via bus 1473. For some image processing operations, the input interface 1460 may update the contents of selected registers in the register file 1472 to reflect the current status of the main data path unit 242. This feature helps the instruction controller 235 to find out what the problem is when there is a problem in executing an image processing operation.

Once the decoding of the instruction word is finished, and/or the control signal S register is loaded with the desired control signals, the instruction controller 235 can 25 indicate to the main data path unit 242 to start performing the desired image processing operation. Once that indication is received, the input interface 1460 begins to accept data objects coming from bus 1451. Depending on the kind of image processing operation performed, the input interface 1460 may also begins to accept operand data coming from operand bus 1452 and/or operand bus 1453, or generates addresses for operand data and receive operand data from operand bus 1452 and/or operand bus 1453. The input interface 1460 then stores and rearranges the incoming data in accordance with the output of the control signal register 1470. The input interface 1460 also generates coordinates to be fetched via buses 1452 and 1453 when calculating Ssuch functions as affine image transformation operations and convolution.

The image data processor 1462 performs the major arithmetic operations on the rearranged data objects from the input interface 1460. The image processor 1462 can: interpolate between two data objects with a provided interpolation factor; multiply two data objects and divide the product by 255; multiply and add two data objects in general; round off fraction parts of a data object which may have various resolutions; A I\ ~D AC.T n 11 -rn i.-rnI I I AY1 124 clamp overflow of a data object to some maximum value and underflow of a data object to some minimum value; and perform scaling and clamping on a data object. The control signals on bus 1471 control which of the above arithmetic operations are performed on the data objects, and the order of the operations.

A ROM 1475 contains the dividends of 255/x, where x is from 0 to 255, rounded in 8.8 format. The ROM 1475 is connected to the input interface 1460 and the image data processor 1462 via bus 1476. The ROM 1475 is used to generate blends of short lengths and multiply one data object by 255 and dividing the product by another data object.

Preferably, the number of operand buses eg 1452 is limited to 2, which is sufficient for most image processing operations.

Fig. 130 illustrates the input interface 1460 in further detail. Input interface *1460 includes data object interface unit 1480, operand interface units 1482 and 1484, *address generation state machine 1486, blend generation state machine 1488, matrix :i 5 multiplication state machine 1490, interpolation state machine 1490, data synchronizer 1500, arithmetic unit 1496. miscellaneous register 1498, and data distribution logic 1505.

Data object interface unit 1480 and operand interface units 1482 and 1484 are responsible to receive data objects and operands from outside. These interface units 1482, 1484 are all config-ured by control signals from control bus 1515. These .i interface units 1482, 1484 have data registers within them to contain the data 0 objects/operands that they have just received, and they all produce a VALID signal which is asserted when the data within the data register is valid. The outputs of the data registers in these interface units 1482, 1484 are connected to data bus 1505. The VALID signals of these interface units 1482, 1484 are connected to flow bus 1510.

When configured to fetch operands, operand interface units 1482 and 1484 accept addresses from arithmetic unit 1496, matrix multiplication state machine 1490 and/or the output of data register in data object interface unit 1480, and select amongst them the required address in accordance with the control signals from control bus 1515. In some cases, the data registers in operand interface units 1482 and 1484 can be configured to store data from the output of data register in data object interface unit 1480 or arithmetic unit 1496, especially when they are not needed to accept and store data from outside.

Address generation state machine 1486 is responsible for controlling arithmetic unit 1496 so that it calculates the next coordinates to be accessed in the source image in affine image transformation operations and convolution operations.

The address generation state machine 1486 waits for START signal on control bus 1515 to be set. When the START signal on control bus 1515 is set, address generation state machine 1486 then de-asserts the STALL signal to data object interface 1O\CISRA\STARW A cTFP IkAcTR I IM) 125 unit 1480, and waits for data objects to arrive. It also sets a counter to be the number of data objects in a kernel descriptor that address generation state machine 1486 needs to fetch. The output of the counter is decoded to become enable signals for data registers in operand interface units 1482 and 1484 and miscellaneous register 1498. When the VALID signal from data object interface unit 1480 is asserted, address generation state machine 1486 decrements the counter, so the next piece of data object is latched into a different register.

When the counter reaches zero, address generation state machine 1486 tells operand interface unit 1482 to start fetching index table values and pixels from operand interface unit 1484. Also, it loads two counters, one with the number of rows, another with the number of columns. At every clock edge, when it is not paused by STALL signals from the operand interface unit 1482 or others, the counters are decremented to give the remaining rows and columns, and the arithmetic unit 1496 calculates the next coordinates to be fetched from. When both counters have reached zero, the counters 15 reload themselves with the number of rows and columns again, and arithmetic unit 1496 is configured to find the top left hand corner of the next matrix.

If interpolation is used to determine the true value of a pixel, address generation state machine 1486 decrements the number of rows and columns after every second clock cycle. This is implemented using a 1-bit counter, with the output used as the enable of the row and column counter. After the matrix is traversed around once, the state machine sends a signal to decrement the count in the length counter. When o the counter reaches 1, and the final index table address is sent to the operand interface unit 1482, the state machine asserts a final signal, and resets the start bit.

Blend generation state machine 1488 is responsible for controlling arithmetic 25 unit 1496 to generate a sequence of numbers from 0 to 255 for the length of a blend.

This sequence of numbers is then used as the interpolation factor to interpolate between the blend start value and blend end value.

Blend generation state machine 1488 determines which mode it should run in (jump mode or step mode). If the blend length is less than or equal to 256, then jump mode is used, otherwize step mode is used.

The blend generation state machine 1488 calculates the following and puts them in registers (regO, regl, reg2). If a blend ramp is in step mode for a predetermined length, then latch 511-length in regO (24 bits), 512 2*length in reg 1 (24 bits), and end-start in reg 2 (4x9 bits). If the ramp is in jump mode, then latch 0 into reg0, 255/(length-1) into regl, and end-start into reg2 (4x9 bits).

In step mode, the following operations are performed for every cycle: If reg0 O, then add reg0 with reg 1 and store the result in reg0. Another incrementor can also be enabled so its output is incremented by I. If reg0 0, then VI MOMMX!

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126 add reg0 with 510 and store the result in reg0. Incrementor is not incremented. The 0 output of the incrementor is the ramp value.

In jump mode, the following is done for every cycle: Add reg0 with regl. The Adder output is 24 bits, in fixed point format of 16.8. Store the adder output in reg0. If the first bit of fraction result is 1, then increment the integer part.

The least 8 bits of the integer part of the incrementor is the ramp value. The ramp value, the output of reg2, and the blend start value is then fed into the image data processor 1462 to produce the ramp.

Matrix multiplication state machine 1490 is responsible for performing linear color space conversion on input data objects using a conversion matrix. The conversion matrix is of the dimension 4X5. The first four columns multiply with the 4 channels in the data object. while the last column contains constant coefficients to be o-*added to the sum of products. When the START signal from control bus 1515 is i o 1 asserted, matrix multiplication state machine does the following: 1) It generates line numbers to fetch constant coefficients of the conversion matrix from buses 1482 and 1484. It also enables miscellaneous register 1498 to store these constant coefficients.

2) It contains a 1-bit flipflop, which generates a line number which is used as an address to fetch half of matrix from buses 1482 and 1484. It also generates :a "MAT_SEL" signal that selects which half of the data object to be multiplied with that half of matrix.

3) It finishes when there is no data objects coming from data object interface unit 1480.

Interpolation state machine 1494 is responsible for performing horizontal interpolation of data objects. During horizontal interpolation, main data path unit 242 accepts a stream of data objects from bus 1451, and interpolates between adjacent data objects to output a stream of data objects which is twice or 4 times as long as the original stream. Since the data objects can be packed bytes or pixels, interpolation state machine 1494 operates differently in each case to maximize the throughput.

Interpolation state machine 1494 does the following: 1) It generates INTSEL signal to data distribution logic 1503 to rearrange the incoming data objects so that the right pair of data objects are interpolated.

2) It generates interpolation factors to interpolate between adjacent pairs of data objects.

3) It generates a STALL signal to stop data object interface unit 1480 from accepting more data objects. This is necessary as the output stream is longer than the input stream. The STALL signal goes to flow bus 1510.

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127 Arithmetic unit 1496 contains circuitry for performing arithmetic calculations.

It is configured by control signals on control bus 1515. It is used by two instructions only: affine image transformation and convolution, and blend generation in compositing.

In affine image transformation and convolution, arithmetic unit 1496 is responsible for: 1) Calculating the next x and y coordinates. To calculate x coordinates arithmetic unit 1496 uses an adder/subtractor to add/subtract the x part of horizontal and vertical delta to/from the current x coordinate. To calculate the y coordinates I 0 arithmetic unit 1498 uses an adder/subtractor to add/subtract the y part of the horizontal or vertical delta to/from the current y coordinate.

2) Adding the y coordinate to the index table offset to calculate the index 000 table address. This sum is also incremented by 4 to find the next index table entry, when interpolation is used to find true value of a pixel.

15 3) Adding the x coordinate to the index table entry to find the address of the pixel.

4) Subtract 1 from the length count.

~In blend generation. arithmetic unit 1496 does the following: 1) In step mode, one of the ramp adders is used to calculate an internal variable in the ramp generation algorithm, while the other adder is used to increment the ramp value when the internal variable is greater than 0.

S 2) In jump mode, only one of the adders is required to add the jump value to the current ramp value.

3) Round off fractions occur in jump mode.

25 4) Subtract start of blend from end of blend at the beginning of ramp generation.

Subtract one from the length count.

Miscellaneous register 1498 provides extra storage space apart from the data registers in data object interface unit 1480 and operand interface units 1482 and 1484.

It is usually used to store internal variables or as a buffer of past data objects from data object interface unit 1480. It is configured by control signals on control bus 1515.

Data synchronizer 1500 is configured by control signals on control bus 1515.

It provides STALL signals to data object interface unit 1480 and operand interface units 1482 and 1484 so that if one of the interface units receives a piece of data object others have not, that interface unit is stalled until all the other interface units have received their pieces of data.

Data distribution logic 1505 rearranges data objects from data bus 1510 and register file 1472 via bus 1530 in accordance with control signals on control bus 1515, including a MATSEL signal from matrix multiplication state machine 1490 and a I HMXL 128 INT SEL signal from interpolation state machine 1494. The rearranged data is outputed onto bus 1461.

Fig. 131 illustrates image data processor 1462 of Fig. 129 in further detail.

Image data processor 1462 includes a pipeline controller 1540, and a number of color channel processors 1545, 1550, 1555 and 1560. All color channel processors accept inputs from bus 1565, which is driven by the input interface 1460 (Fig. 131). All color channel processors and pipeline controller 1540 are configured by control signals from control signal register 1470 via bus 1472. All the color channel processors also accept inputs from register file 1472 and ROM 1475 of Fig. 129 via bus 1580. The outputs of all the color channel processors and pipeline controller are grouped together to form bus 1570, which forms the output 1455 of image data processor 1462.

Pipeline controller 1540 controls the flow of data objects within all the color channel processors by enabling and disabling registers within all the color channel processors. Within pipeline controller 1540 there is a pipeline of registers. The shape 15 and depth of the pipeline is configured by the control signals from bus 1471, and the pipeline in pipeline controller 1540 has the same shape as the pipeline in the color channel processors. The Pipeline controller accepts VALID signals from bus 1565.

o For each pipeline stage within pipeline controller 1540, if the incoming VALID signal is asserted and the pipeline stage is not stalled, then the pipeline stage asserts the register enable signals to all color channel processors, and latch the incoming VALID e* signal. The output of the latch then a VALID signal going to the next pipeline stage.

In this way the movement of data objects in the pipeline is simulated and controlled, without storage of any data.

0 Color channel processors 1545, 1550, 1555 and 1560 perform the main arithmetic operations on incoming data objects, with each of them responsible for one "1of the channels of the output data object. In the preferred embodiment the number of S color channel processors is limited to 4, since most pixel data objects have a maximum of 4 channels.

One of the color channel processors processes the opacity channel of a pixel.

There is additional circuitry (not shown in Fig. 131), connected to the control bus 1471, which transforms the control signals from the control bus 1471 so that the color channel processor processes the opacity channel correctly, as for some image processing operations the operations on the opacity channel is slightly different from the operations on the color channels.

Fig. 132 illustrates color channel processor 1545, 1550, 1555 or 1560 (generally denoted by 1600 in Fig. 132) in further detail. Each color channel processor 1545, 1550. 1555 or 1560 includes processing block A 1610, processing block B 1615, big adder 1620, fraction rounder 1625, clamp-or-wrapper 1630, and output multiplexer 1635. The color channel processor 1600 accepts control signals from control signal [O:\CISR\STAR\MASTERIMSTRV I MXL 129 register 1470 via bus 1602. enable signals from pipeline controller 1540 via bus 1604, information from register file 1472 via bus 1605. data objects from other color channel processor via bus 1603, and data objects from input interface 1460 via bus 1601.

Processing block A 1610 performs some arithmetic operations on the data objects from bus 1601, and produces partially computed data objects on bus 161.1. The following illustrates what processing block A 1610 does for designated image processing operations.

In compositing, processing block A 1610 pre-multiplies data objects from data object bus 1451 with opacity, interpolates between a blend start value and a blend end value with an interpolation factor from input interface 1460 in Fig. 129, pre-multiplies operands from operand bus 1452 in Fig. 129 or multiplies blend color by opacity, and attenuates multiplication on pre-multiplied operand or blend color data.

In general color space conversion, the processing block A 1610 interpolates between 4 color table values using two fraction values from bus 1451 in Fig. 129.

15 In affine image transformation and convolution, the processing block A 1610 pre-multiplies the color of the source pixel by opacity, and interpolates between pixels on the same row using the fraction part of current x-coordinate.

In linear color space conversion, the processing block A 1610 pre-multiplies color of the source pixel by opacity, and multiplies pre-multiplied color data with S" 20 conversion matrix coefficients.

In horizontal interpolation and vertical interpolation, the processing block A 1610 interpolates between two data objects.

.0.i In residual merging, the processing block A 1610 adds two data objects.

9 9Processing block A 1610 includes a number of multifunction blocks 1640 and processing block A glue logic 1645. The multifunction blocks 1640 are configured by ".control signals, and may perform any one of the following functions: add/subtract two data objects; passing one data object; interpolate between two data objects with a interpolation factor; pre-multiply a color with an opacity; multiply two data objects, and then add a third data object to the product; and add/subtract two data objects, and then pre-multiply the sum/difference with an opacity.

The registers within the multifunction blocks 1640 are enabled or disabled by enable signals from bus 1604 generated by pipelined controller 1540 in Fig. 131.

Processing block A glue logic 1645 accepts data objects from bus 1601 and data objects from bus 1603, and the outputs of some of the multifunction blocks 1640, and routes them to inputs of other selected multifunction blocks 1640. Processing block A glue logic 1645 is also configured by control signals from bus 1602.

(O:\C1SRA\STAR\MASTERJMSTRV IHMXL 130 Processing block B 1615 performs arithmetic operations on the data objects from bus 1601, and partially computed data objects from bus 1611, to produce partially computed data objects on bus 1616. The following description illustrates what processing block B 1615 does for designated image processing operations.

In compositing (with non-plus operators), the processing block B 1615 multiplies pre-processed data objects from data object bus 1451 and operands from operand bus 1452 with compositing multiplicands from bus 1603, and multiplies clamped/wrapped data objects by output of the ROM, which is 255/opacity in 8.8 format.

In compositing with plus operator, the processing block B 1615 adds two preprocessed data objects. In the opacity channel, it also subtracts 255 from the sum, multiplies an offset with the difference, and divides the product by 255.

In general color space conversion, the processing block B 1615 interpolates between 4 color table values using 2 of the fraction values from bus 1451, and interpolates between partially interpolated color value from processing block A 1610 and the result of the previous interpolation using the remaining fraction value.

In affine image transformation and convolution, the processing block B 1615 interpolates between partially interpolated pixels using the fraction part of current ycoordinate, and multiplies interpolated pixels with coefficients in a sub-sample weight 20 matrix.

In linear color space conversion, the processing block B 1615 pre-multiplies the color of the source pixel by opacity, and multiplies pre-multiplied color with :conversion matrix coefficients.

S Processing block B 1615 again includes a number of multifunction blocks and processing block B glue logic 1650. The multifunction blocks are exactly the same as those in processing block A 1610, but the processing block B glue logic 1650 accepts data objects from buses 1601, 1603. 1611, 1631 and the outputs of selected multifunction blocks and routes them to the inputs of selected multifunction blocks.

Processing block B glue logic 1650 is also configured by control signals from bus 1602.

Big adder 1620 is responsible for combining some of the partial results from processing block A 1610 and processing block B 1615. It accepts inputs from input interface 1460 via bus 1601, processing block A 1610 via bus 1611, processing block B 1615 via bus 1616, and register file 1472 via bus 1605, and it produces the combined result on bus 1621. It is also configured by control signals on bus 1602.

For various image processing operations, big adder 1620 may be configured differently. The following description illustrates its operation during designated image processing operations.

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131 In compositing with non-plus operators, the big adder 1620 adds two partial products from processing block B 1615 together.

In compositing with plus operator, the big adder 1620 subtracts the sum of preprocessed data objects with offset from the opacity channel, if an offset enable is on.

In affine image transformation/convolution, the big adder 1620 accumulates the products from processing block B 1615 In linear color space conversion, in the first cycle, the big adder adds the two matrix coefficients/data object products and the constant coefficient together. In the second cycle, it adds the sum of last cycle with another two matrix coefficients/data object products together.

Fraction rounder 1625 accepts input from the big adder 1620 via bus 1621 and rounds off the fraction part of the output. The number of bits representing the fraction part is described by a BP signal on bus 1605 from register file 1472. The following table shows how the BP signal is interpreted. The rounded output is provided on bus 1626.

Table 27: Fraction Table bp field Meaning 0 Bottom 26 bits are fractions.

1 Bottom 24 bits are fractions.

2 Bottom 22 bits are fractions.

3 Bottom 20 bits are fractions.

4 Bottom 18 bits are fractions.

5 Bottom 16 bits are fractions.

6 Bottom 14 bits are fractions.

7 Bottom 12 bits are fractions.

As well as rounding off fraction, fraction rounder 1625 also does two things: 1) determines whether the rounded result is negative; and 2) determines whether the absolute value of the rounded result is greater than 255.

Clamp-or-wrapper 1630 accepts inputs from fraction rounder 1625 via bus 1626 and does the following in the order described: finds the absolute value of the rounded result, if such option is enabled; and clamps any underflow of the data object to the minimum value of the data object, and any overflow of the data object to the maximum value of the data object.

Output multiplexer 1635 selects the final output from the output of processing block B on bus 1616 and the output of clamp-or-wrapper on bus 1631. It also performs 1O:\CISRA\STAR\MASTERIMSTRV! IIMXL 132 some final processing on the data object. The following description illustrates its operation for designated image processing operations.

In compositing with non-plus operators and un-pre-multiplication, the multiplexer 1635 combines some of the outputs of processing block B 1615 to form the un-pre-multiplied data object.

In compositing with non-plus operator and no un-pre-multiplication, the multiplexer 1635 passes on the output of clamp-or-wrapper 1630.

In compositing with plus operator, the multiplexer 1635 combines some of the outputs of processing block B 1630 to form resultant data object.

In general color space conversion, the multiplexer 1635 applies the translateand-clamp function on the output data object.

In other operations, the multiplexer 1635 passes on the output of clamp-orwrapper 1630.

Fig. 133 illustrates a single multifunction block 1640) in further detail.

15 Multifunction block 1640 includes mode detector 1710, two addition operand logic units 1660 and 1670, 3 multiplexing logic units 1680, 1685 and 1690, a 2-input adder 1675, a 2-input multiplier with 2 addends 1695, and register 1705.

Mode detector 1710 accepts one input from control signal register 1470, in Fig. 129 the MODE signal 1711, and two inputs from input interface 1460, in Fig. 129 20 SUB signal 1712 and SWAP signal 1713. Mode detector 1710 decodes these signals S into control signals going to addition operand logic units 1660 and 1670, and multiplexing logic units 1680, 1685 and 1690, and these control signals configure multifunction block 1640 to perform various operations. There are 8 modes in multifunction block 1640: 1) Add/sub mode: adds or subtract input 1655 to/from input 1665, in accordance with the SUB signal 1712. Also, the inputs can be swapped in accordance with the SWAP signal 693.

2) Bypass mode: bypass input 1655 to output.

3) Interpolate mode: interpolates between inputs 1655 and 1665 using input 1675 as the interpolation factor. Inputs 1655 and 1665 can be swapped in accordance with the SWAP signal 1713.

4) Pre-multiply mode: multiplies input 1655 with input 1675 and divide it by 255. The output of the INC register 1708 tells the next stage whether to increment the result of this stage in bus 1707 to obtain the correct result.

5) Multiply mode: multiplies input 1655 with 1675.

6) Add/subtract-and-pre-multiply mode: adds/subtracts input 1665 to/from input 1655, multiplies the sum/difference with input 1675, and then divide the product by 255. The output of the INC register 1708 tells the next stage whether to increment the result of this stage in bus 1707 to obtain the correct result.

IO:\CISRA\WTAR\MASTERIMSTRVI HMXL 133 Addition operand logic units 1660 and 1670 find one's complement of the input on demand, so that the adder can do subtraction as well. Adder 1675 adds the outputs of addition operand logic 1660 and 1670 in buses 1662 and 1672 together, and outputs the sum in bus 1677.

Multiplexing logic 1680, 1685 and 1690 select suitable multiplicands and addends to implement, a desired function. They are all configured by control signals on bus 1714 from mode detector 1710.

Multiplier with two addends 1695 multiplies input from bus 1677 with input from bus 1682, then adds the products to the sum of inputs from buses 1687 and 1692.

Adder 1700 adds the least significant 8 bits of the output of multiplier 1695 with the most significant 8 bits of the output of multiplier 1695. The carryout of adder 1700 is latched in INC register 1701. INC register 1701 is enabled by signal 1702.

Register 1705 stores the product from multiplier 1695. It is also enabled by signal 1702.

15 Fig. 134 illustrates a block diagram for the compositing operations. The compositing operation accepts three input streams of data: 1) The accumulated pixel data, which is derived from the same location as the result is stored to in this accumulator model.

2) A compositing operand which consists of color and opacity. The color 20 and opacity can both be either flat, a blend, pixels or tiled.

3) Attenuation which attenuates the operand data. The attenuation can be flat, a bit map or a byte map.

*Pixel data typically consists of four channels. Three of these channels make up the color of the pixel. The remaining channel is the opacity of the pixel. Pixel data can be pre-multiplied or normal. When pixel data is pre-multiplied, each of the color channels are multiplied with the opacity. Since equations for compositing operators are simple with pre-multiplied pixels, usually pixel data is pre-multiplied before it is composited with another pixel.

The compositing operators implemented in the preferred embodiments are shown in Table 1. Each operator works on pre-multiplied data. (aco, a o refers to a pre-multiplied pixel of color ac and opacity ao, r is the "offset" value and wco is the wrapping/clamping operator the reverse operator of each of the over, in, out, atop operators in Table 1 is also implemented, and the compositing model has the accumulator on the left.

Composite block 1760 in Fig. 134 comprizes three color sub-blocks and a opacity sub-block. Each color sub-block operates on one color channel, and opacity channel of the input pixels to obtain the color of the output pixel. The following pseudo code shows how this is done.

A\STAR\MASTERIMSTRV HMXL 134 SPIXEL Composite( IN colorA, colorB: PIXEL; IN opacityA, opacityB: PIXEL; IN comp_op: COMPOSITEOPERATOR PIXEL result; IF comp_op is rover. rin, rout, ratop THEN swap colorA and colorB; swap opacityA and opacityB; END IF; IF comp-op is over or rover or loado or plus THEN X= 1; ELSE IF comp_op is in or rin or atop or ratop THEN X opacirvB; 15 ELSE IF comp-op is out or rout or xor THEN X not(opacityB); ELSE IF comp-op is loadzero or loadc or loadco THEN X 0 END IF; 20 IF comp-op is over or rover or atop or ratop or xor THEN Y not(opacitya); ELSE IF comp_op is plus or loadc or loadco THEN Y not(opacitya); ELSE IF comp_op is plus or loadc or loadco THEN Y 1; ELSE IF comp-op is in or rin or out or rout or loadzero or loado THEN Y=0 END IF; result colorA X colorB Y; RETURN result; The above pseudo code is different for the opacity sub-block, since the operators 'loade' and 'loado" have different meaning in the opacity channel.

Block 1765 in Fig. 134 is responsible for clamping or wrapping the output of block 1760. When block 1765 is configured to clamp, it forces all values less than the minimum allowable value to the minimum allowed value, and all values more than the maximum allowed value to the maximum allowed value. If block 1765 is configured to wrap, it calculates the following equation: rO:\CISRA\STA R\MASTFR IMSTRV I I IMXL- 135 ((x-min) mod (max-min)) min, whereby min and max are the minimum and maximum allowed value of the color respectively. Preferably the minimum value for a color is 0. and the maximum value is 255.

Block 1770 in Fig. 134 is responsible for un-pre-multiplying the result-from block 1765. It un-pre-multiplies a pixel by multiplying the pre-multiplied color value with 255/o, where o is the opacity after composition. The value 255/o is obtained from a ROM inside the compositing engine. The value stored in the ROM is in the format of 8.8 and the rest of the fraction is rounded. The result of multiplication is stored in the format of 16.8. The result would be rounded to 8 bits to produce the un-pre-multiplied pixel.

Blend generator 1721 generates a blend of a specified length with specified start and end values. Blend generation is done in two stages: 1) ramp generation, and Is5 2) interpolation In ramp generation, the compositing engine generates a linearly increasing number sequence from 0 to 255 over the length of the instruction. There are two modes in ramp generation: the "jump" mode, when the length is less than or equal to 255, and the "step" mode when the length is greater than 255. The mode is determined 20 by examining the 24 most significant bits of the length. In the jump mode, the ramp value increases by at least one in every clock period. In the step mode, the ramp value increases by at most one in every clock period.

In the jump mode. the compositing engine uses the ROM to find out the step value 255/(length-1), in 8.8 format. This value is then added to a 16-bit accumulator.

The output of the accumulator is rounded to 8 bits to form the number sequence. In the step mode, the compositing engine uses an algorithm similar to Bresenham's line drawing algorithm, as described by the following pseudo code.

Void linedraw length: INTEGER d 511 length; incrE 510; incrNE 512 2*length; ramp 0: for ilength; i+ if d 0 then d incrE; else [O:\CISPL\STAR\MATERIMSTRVI IIMXL 136 d incrNE: ramp+ After that, the following equation is calculated to generate the blend from the ramp.

Blend (tend start) x ramp/255) start The division by 255 is rounded. The above equation requires 2 adders and a block that "pre-multiplies" tend-start) by ramp for each channel.

Another image processing operation that the main data path unit 242 is able to perform is general color space conversion. Generalized Color Space Conversion (GCSC) uses piecewize tri-linear interpolation to find out the output color value.

Preferably, conversion is from a three dimensional input space to one or four 15 dimensional output space.

In some cases, there is a problem with the accuracy of tri-linear interpolation at the edges of the color gamut. This problem is most noticeable in printing devices that have high sensitivity near an edge of the gamut. To overcome this problem, GCSC can optionally be calculated in an expanded output color space and then scaled and S. 20 clamped to the appropriate range using the formula in equation: 0 if x(63 out 2(x-64) if(64(x(191) 255 if(192(x) Yet other image processing operations that the preferred embodiment is able to perform are image transformation and convolution. In image transformation, the source image is scaled, rotated, or skewed to form the destination image. In convolution, the source image pixels are sampled with a convolution matrix to provide the destination image. To construct a scanline in the destination image, the following steps are required: 1) Perform an inverse transform of the scanline in the destination image back to the source image as illustrated in Fig. 135. This tells what pixels in the source Simage are needed to construct that scanline in the destination image.

2) Decompress the necessary portions of the source image.

3) Inverse-transform the starting x and y coordinates, horizontal and vertical subsampling distances in the destination image back to source image.

[O:ACISRA\STAR\WASTERIISTRVI HNIXL 137 4) Pass all these information to the processing units which performs the necessary sub-sampling and/or interpolation to construct the output image pixel by pixel.

The calculations to work out which parts of the source image are relevant, sub- S sampling frequencies to use, etc, are performed by the host application. Sub-sampling, interpolation, and writing the pixels into the destination image memory are done by the preferred embodiments.

Fig. 136 shows a block diagram of the steps required to calculate the value for a destination pixel. In general, the computation-intensive part is the bi-linear interpolation. The block diagram in Fig. 136 assumes that all the necessary source image pixels are available.

The final step in calculating a destination pixel is to add together all the possibly bi-linearly interpolated sub-samples from the source image. These values are .0 given different weights.

*ooo 0 .0 15 Fig. 137 illustrates a block diagram of the image transformation engine that can be derived from suitable settings within the main data path unit 242. Image transformation engine 1830 includes address generator 1831, pre-multiplier 1832, S"interpolator 1833, accumulator 1834, and logic for rounding, clamping and finding absolute value 1835.

2" 20 Address generator 1831 is responsible for generating x and y coordinates of the source image which are needed to construct a destination pixel. It also generates addresses to obtain index offsets from an input index table 1815 and pixels from image 1810. Before address generator 1831 begins generating x and y coordinates in the source image, it reads in a kernel descriptor. These are two formats of kernel 25 descriptors. They are shown in Fig. 138. The kernel descriptor describes: 1) Source image start coordinates (unsigned fixed point, 24.24 resolution).

Location is at the top left of the image.

2) Horizontal and vertical sub-sample deltas (2's complement fixed point, 24.24 resolution).

3) a 3 bit bp field defining the location of the binary point within the fixed point matrix coefficients. The definition and interpretation of the bp field is shown in Fig. 150.

4) Accumulation matrix coefficients. These are of "variable" point resolution of 20 binary places (2's complement), with the location of the binary point implicitly specified by the bp field.

an rl field that indicates the remaining number of words in the kernel descriptor. This value is equal to the number of rows times the number of columns minus 1.

1O:\CISRA\STAR\MASNTFR1MvTRV I 14MYI 138 For the short kernel descriptor, apart from the integer part of start x coordinate, the other parameters are assumed to have the following values: starting x coordinate fraction starting y coordinate horizontal delta vertical delta After address generator 1831 is configured, it calculates the current coordinates. It does this in two different ways. depending on the dimensions of the subsample matrix. If the dimensions of the subsample matrix are 1 x 1, address generator 1831 adds the horizontal delta to the current coordinates until it has generated enough coordinates.

If the dimensions of the subsample matrix are not 1 x 1, address generator 1831 adds the horizontal delta to the current coordinates until one row of the matrix is "o finished. After that, address generator 1831 adds the vertical delta to the current *444 *l 15 coordinates to find the coordinates on the next row. After that, address generator 1831 subtracts the horizontal delta from the current coordinates to find the next coordinates, until one more row is finished. After that, address generator 1831 adds the vertical S0.0 delta to the current coordinates and the procedure is repeated again. Top diagram in Fig. 150 illustrates this method of accessing the matrix. Using this scheme, the matrix o4*. 20 is traversed in a zig-zag way, and fewer registers are required since the current x and y coordinates are calculated using the above method, the accumulation matrix coefficients must be listed in the kernel descriptor in the same order.

After generating the current coordinates, the address generator 1831 adds the y 0. coordinate to the index table base address to get the address to the index table. (In case when source pixels are interpolated, address generator 1831 needs to obtain the next index table entry as well.) The index table base address should point to the index table 4.44 entry for y 0. After obtaining the index offset from the index table, the address generator 1831 adds that to the x coordinate. The sum is used to get 1 pixel from the source image (or 2 if source pixels are interpolated). In case when source pixels are interpolated, the address generator 1831 adds the x coordinates to the next index offset, and two more pixels are obtained.

Convolution uses a similar method to generate coordinates to image transformation. The only difference is that in convolution, the start coordinates of the matrix for the next output pixel is one horizontal delta away from the starting coordinates of the matrix for the previous pixel. In image transformation, the starting coordinates of the matrix for the next pixel is one horizontal delta away from the coordinates of the top right pixel in the matrix for the previous output pixel.

The middle diagrams in Fig. 139 illustrates this difference.

[O:\CISRA\STAR\MASTERIMSTRV I I 1MXL 139 Pre-multiplier 1832 multiplies the color channels with the opacity channel of the pixel if required.

Interpolator 1832 interpolates between source pixels to find the true color of the pixel required. It gets two pixels from the source image memory at all times. Then S it interpolates between those two pixels using the fraction part of the current x coordinate and puts the result in a register. After that, it obtains the two pixels on the next row from the source image memory. Then it interpolates between those two pixels using the same x fraction. After that, interpolator 1833 uses the fraction part of the current y coordinate to interpolate between this interpolated result and the last interpolated result.

Accumulator 1834 does two things: 1) it multiplies the matrix coefficients with the pixel, and 2) it accumulates the product above until the whole matrix is traversed. Then it outputs a value to the next stage.

Preferably the accumulator 1834 can be initialized with 0 or a special value on a channel-by-channel basis.

Block 1835 rounds the output of accumulator 1834, then clamps any underflows or overflows to the maximum and minimum values if required, and finds the absolute value of the output if required. The location of the binary point within the output of the accumulator is specified by the bp field in the kernel descriptor. The bp field indicates the number of leading bits in the accumulated result to discard. This is shown in the bottom diagram of Fig. 139. Note that the accumulated value is treated as a signed two's complement number.

Yet another image processing operation that the main data path unit 242 can perform is matrix multiplication. Matrix Multiplication is used for color space conversion where an affine relationship exists between the two spaces. This is distinct o *from General Color Space Conversion (based on tri-linear interpolation).

The result of Matrix Multiplication is defined by the following equation: ry blo b, 1 4 a., r, b b21 b,2 b2.3 b2,4 a.

ro b 0 .34 J ao Jo b 3.o b1 b32 b3,3 b3 [2 where r i is the result pixel and a i is the A operand pixel. Matrix must be 5 columns by 4 rows.

Fig. 140 illustrates a block diagram of the multiplier-adders that perform the matrix multiplication in the main data path unit 242. It includes multipliers to multiply (O:\CISRA\STAR\MASTERIMSTRV I HMXL 140 the matrix coefficients with the pixel channels, adders to add the products together, and logic to clamp and find the absolute value of the output if required.

The complete matrix multiplication takes 2 clock cycles to complete. At each cycle the multiplexers are configured differently to select the right data for the multipliers and adders.

At cycle 0, the least significant 2 bytes of the pixel are selected by the multiplexers 1851, 1852. They then multiply the coefficients on the left 2 columns of the matrix, i.e. the matrix coefficients on line 0 in the cache. The results of the multiplication, and the constant term in the matrix, are then added together and stored.

At cycle 1, the more significant 2 bytes of the pixel are selected by the top multiplexers. They then multiply the coefficients on the right 2 columns of the matrix.

The result of the multiplication is then added 1854 to the result of the last cycle. The sum of the adder is then rounded 1855 to 8 bits.

The 'operand logic' 1856 rearranges the outputs of the multipliers to form four of the inputs of the adder 1854. It rearranges the outputs of the multipliers so that they V *can be added together to form the true product of the 24-bit coefficient and 8-bit pixel component.

The 'AC (Absolute value-clamp/wrap) logic' 1855 firstly rounds off the bottom 12 bits of the adder output. It then finds the absolute value of the rounded result if it is set to do so. After that it clamps or wraps the result according to how it is set up. If the 'AC logic' is set to clamp, it forces all values less than 0 to 0 and all values more than 255 to 255. If the 'AC logic' is set to wrap, the lower 8 bits of the integer part is passed to the output.

Apart from the image processing operations above, the main data path unit 242 can be configured to perform other operations.

The foregoing description provides a computer architecture that is capable of performing various image processing operations at high speed, while the cost is reduced by design reuse. The computer architecture described is also highly flexible, allowing any external programming agent with intimate knowledge of the architecture to configure it to perform image processing operations that were not initially expected.

Also, as the core of the design mainly comprizes a number of those multifunction blocks, the design effort is reduced significantly.

3.18.6 Data Cache Controller and Cache The data cache controller 240 maintains a four-kilobyte read data cache 230 within the coprocessor 224. The data cache 230 is arranged as a direct mapped RAM cache, where any one of a group of lines of the same length in external memory can be mapped directly to the same line of the same length in cache memory 230 (Fig This line in cache memory is commonly referred to as a cache-line. The cache memory comprizes a multiple number of such cache-lines.

1O:\CISRPMSTAR\MASTERIMSTRV I "MXL 141 The data cache controller 240 services data requests from the two operand organizers 247, 248. It first checks to see if the data is resident in cache 230. If not, data will be fetched from external memory. The data cache controller 240 has a programmable address generator, which enables the data cache controller 240 to operate in a number of different addressing modes. There are also special addressing modes where the address of the data requested is generated by the data cache controller 240. The modes can also involve supplying up to eight words (256 bits) of data to the operand organizers 247, 248 simultaneously.

The cache RAM is organized as 8 separately addressable memory banks. This is needed for some of the special addressing modes where data from each bank (which is addressed by a different line address) is retrieved and packed into 256 bits. This arrangement also allows up to eight 32-bits requests to be serviced simultaneously if they come from different banks.

The cache operates in the following modes, which will be discussed in more detail later. Preferably, it is possible to automatically fill the entire cache if this is desired.

1. Normal Mode 2. Single Output General Color Space Conversion Mode 3. Multiple Output General Color Space Conversion Mode 4. JPEG Encoding Mode 20 5. Slow JPEG Decoding Mode 6. Matrix Multiplication Mode 7. Disabled Mode 8. Invalidate Mode Fig. 141 shows the address, data and control flow of the data cache controller 240 and data cache 230 shown in figure 2.

The data cache 230, consists of a direct mapped cache of the type previously discussed. The data cache controller 240, consists of a tag memory 1872 having a tag entry for each cache-line, which tag entry comprizes the most significant part of the external memory address that the cache-line is currently mapped to. There is also a line valid status memory 1873 to indicate whether the current cache-line is valid. All cache-lines are initially invalid.

The data cache controller 240 can service data requests from operand organizer B 247 (Fig 2) and operand organizer C 248 (Fig. 2) simultaneously via the operand bus interface 1875. In operation, one or both of the operand organizers 247 or 248 (Fig.

supplies an index 1874 and asserts a data request signal 1876. The address generator 1881 generates one or more complete external addresses 1877 in response to the index 1874. A cache controller 1878 determines if the requested data is present in cache 230 by checking the tag memory 1872 entries for the tag addresses of the generated addresses 1877 and checking the line valid status memory 1873 for the IO:\CISRA\STAR\MASTERIMSTRVI HMXL 142 validity of the relevant cache-line(s). If the requested data is present in cache memory 230, an acknowledgment signal 1879 is supplied to the relevant operand organizer 247 or 248 together with the requested data 1880. If the requested data is not present in the cache 230, the requested data 1870 is fetched from external memory, via an input bus interface 1871 and the input interface switch 252 (Fig. The data 1870 is fetched by asserting a request signal 1882 and supplying the generated address(es) 1877 of the requested data 1870. An acknowledgement signal 1883 and the requested data 1870 are then sent to the cache controller 1878 and the cache memory 230 respectively. The relevant cache-line(s) of the cache memory 230 are then updated with the new data 1870. The tag addresses of the new cache-line(s) are also written into tag memory 1872, and the line valid status 1873 for the new cache-line(s) are asserted. An acknowledgment signal 1879 is then sent to the relevant operand organizer 247 or 248 (Fig 2) together with the data 1870.

Turning now to Fig. 142, which shows the memory organization of the data cache 230. The data cache 230 is arranged as a direct mapped cache with 128 cache-lines C0,...,C127 and a cache-line length of 32 bytes. The cache RAM consists of 8 separately addressable memory banks each having 128 bank-lines of 32 bits, with each cache-line Ci consisting of the corresponding 8 bank-lines BOi,...,B7i of the 8 memory banks BO,...B7.

The composition of the generated complete external memory address is shown in Fig. 143. The generated address is a 32-bit word having a 20-bit tag address, a 7-bit line address, a 3-bit bank address and a 2-bit byte address. The 20-bit tag address is used for comparing the tag address with the tag stored in the tag memory 1872. The 7- *bit line address is used for addressing the relevant cache-line in the cache memory 1870. The 3-bit bank address is used for addressing the relevant bank of the memory banks of the cache memory 1870. The 2-bit byte address is used for addressing the S• relevant byte in the 32-bit bank line.

Turning now to Fig. 144, which shows a block diagram of the data cache controller 240 and data cache 230 arrangement. In this arrangement, a 128 by 256 bit RAM makes up the cache memory 230, and as noted previously is organized as 8 separately addressable memory banks of 128 by 32 bits. This RAM has a common write enable port (write). a common write address port (write_addr) and a common write data port (write_data). The RAM also has a read enable port (read), eight read address ports (read_addr) and eight read data output ports (read_data). A write enable signal is generated by the cache controller block 1878 for supply to the common write enable port (write) for simultaneously enabling writing to all of the memory banks of the cache memory 230. When required, the data cache 230 is updated by one or more lines of data from external memory via the common write data port (write_data). A line of data is written utilizing the 8:1 multiplexer MUX supplying the line address to [O:\CISRA\STARWMASTER]MSTRV I HMXL 143 the write address port (write_addr). The 8:1 multiplexer MUX selects the line address from the generated external addresses under the control of the data cache controller (addrselect). A read enable signal is generated by the cache controller block 1878 for supply to the common read port (read) for simultaneously enabling reading of all the memory banks of cache memory 230. In this way, eight different bank-lines of data can be simultaneously read from eight read data ports (read_data) in response to respective line addresses supplied on the eight read address ports (read_addr) of the memory banks of the cache memory 230.

Each bank of the cache memory 230 has its own programmable address generator 1881. This allows eight different locations to be simultaneously accessed from the respective eight banks of memory. Each address generator 1881 has a dcc-mode input for setting the mode of operation of the address generator 1881, an index-packet input, a base-address input and an address output. The modes of operation of the programmable address generator 1881 include Random access mode where a signal on the dcc-mode input sets each address generator 1881 to the random access mode and complete external memory address(es) are supplied on the index-packet input(s) and outputted on the address output of one or more of the address generators 1881; and JPEG encoding and decoding, color space conversion, and matrix multiplication modes, where a signal on the dcc-mode input sets each address generator 1881 to the appropriate mode. In these modes, each address generator 1881 receives an index on the index-packet input and generates an index address. The index addresses are then added to a fixed base address supplied on the base-address input resulting in a complete external memory address which is then outputted on the address output.

Depending upon the mode of operation, the address generators are able to generate up to eight different complete external memory addresses.

The eight address generators 1881 consist of eight different combinational logic circuits each having as their inputs; a base-address, a dcc-mode and an index and each having a complete external memory address as an output.

A base-address register 1885 stores the current base address that is combined with the index packet and a dcc-mode register 1888 stores the current operational mode (dccmode) of the data cache controller 240.

The tag memory 1872 comprizes one block of 128 by 20 bit, multi- port RAM.

This RAM has one write port (update-line-addr), one write enable port (write), eight read ports (readOline-addr read71ine-addr) and eight read output ports (tagO_data,...,tag7_data). This enables eight simultaneous lookups on the ports (readOline-addr,... ,read7line-addr) by the eight address generators 1881 to determine, for each line address of the one or more generated memory addresses, the tag addresses currently stored for those lines. The current tag addresses for those lines are outputted fO:\CISRA\STAR\MASTERMSTRV I HMXL 144 on the ports (tag0-data,... tag7-data) to the tag comparator 1886. When required, a tag write signal is generated by the cache controller block 1878 for supply to the write port (write) of the tag memory 1872 to enable writing to the tag memory 1872 on the port (update-line-addr).

A 128-bit line valid memory 1873 contains the line valid status for each cacheline of the cache memory 230. This is 128 by 1 bit memory with one write port (update-line-addr), one write enable port (update), eight read ports (readOlineaddr,...,read71ine-addr) and eight read output ports (linevalidO,..,linevalid7). In a similar manner to the tag memory, this allows eight simultaneous lookups on the ports (read01ine-addr,...,read71ine-addr) by the eight address generators 1881 to determine.

for each line address of the one or more generated memory addresses, the line valid status bits currently stored for those lines. The current line valid bits for those lines are outputted on the ports (linevalid0,...,linevalid7) to the tag comparator 1886. When required, a write signal is generated by the cache controller block 1878 for supply to 15 the write port (update) of the line valid status memory 1873 to enable writing to the line valid status memory 1873 on the port (update-line-addr).

The tag comparator block 1886 consists of eight identical tag comparators having; tag_data inputs for respectively receiving the tag addresses currently stored in tag memory 1872 at those lines accessed by the line addresses of the currently generated complete external addresses, tag_addr inputs for respectively receiving the. tag addresses of the currently generated complete external memory addresses, a dcc_input for receiving the current operational mode signal (dcc_mode) for setting the parts of the tag addresses to be compared, and a line_valid input for receiving the line valid status .bits currently stored in the line valid status memory 1873 at those lines accessed by the line addresses of the currently generated complete external memory addresses. The comparator block 1886 has eight hit outputs for each of the eight address generators 1881. A hit signal is asserted when the tag address of the generated complete external memory address matches the contents of the tag memory 1872 at the location accessed by the line address of the generated complete external memory address, and the line valid status bit 1873 for that line is asserted. In this particular embodiment, the data structures stored in external memory are small, and hence the most significant bits of the tag addresses are the same. Thus it is preferable to compare only those least significant bits of the tag addresses which may vary. This is achieved by the current operational mode signal (dcc_mode) setting the tag comparator 1886 for comparing those least significant bits of the tag addresses which may vary.

The cache controller 1878 accepts a request (proc_req) 1876 from the operand B 247 or operand C 248 and acknowledges (proc_ack) 1879 this request if the data is available in cache memory 230. Depending on the mode of operation, up to eight differently addressed data items may be requested, one from each of the eight banks of [O\CISRA\STAR\MASTER IMSTRV I HMXL 145 cache memory 230. The requested data is available in cache memory 230 when the tag comparator 1886 asserts a hit for that line of memory. The cache controller 1878 in response to the asserted hit signal (hitO,...hit7) generates a read enable signal on the port (cache_read) for enabling reading of those cache-lines for which the hit signal has been asserted. When a request (proc_req) 1876 is asserted, but not the hit signal (hitO, ,hit7), a generated request (ext_req) 1890 is sent to the external memory together with the complete external memory address for that cache-line of data. This cache-line is written into the eight banks of cache memory 230 via the input (extdata) when it is available from the external memory. When this happens, the tag information is also written into the tag memory 1886 at that line address, and the line status bit 1873 for that line asserted.

Data from the eight banks of cache memory 230 is then outputted through a series of multiplexers in a data organizer 1892, so that data is positioned in a predetermined manner in an output data packet 1894. In one operational mode, the data organizer 1892 is able to select and output eight 8-bit words from the respective eight 32-bit words outputted from the eight memory banks by utilising the current operational mode signal (dcc_mode) and the byte addresses (byteaddr) of the current generated complete external memory addresses. In another operational mode, the data organizer 1892 directly outputs the eight 32-bit words outputted from the eight memory banks. As noted previously, the data organizer arranges this data in a predetermined manner for output.

A request would comprize the following steps: 1) The processing unit requests a packet of data by supplying an address to the processing unit interface of the cache controller 1878: 2) Each of the eight address generator units 1881 then generate a separate address for each block of cache memory depending on the mode of operation; 3) The Tag portion of each of the generated addresses is then compared to the Tag address stored in the four blocks of triple-port Tag memory 1886 and addressed by each of the corresponding line part of the eight generated addresses; 4) If they match, and the line valid status 1873 for that line is also asserted, the data requested for that block of memory is deemed to be resident in the said cache memory 230; Data that is not resident is fetched via the external bus 1890 and all eight blocks of the cache memory 230 are updated with that line of data from external memory. The Tag address of the new data is then written to the Tag memory 1886 at the said line address, and the line valid status 1873 for that line asserted; 6) When all requested data items are resident in cache memory 230, it is presented to the processing unit in a predetermined packet format.

[O:\CISRA\STAR\MASTERJMSTRVI IhfdXL 146 As previously noted, all the modules (Fig 2) of the coproccessor 224 include a 1 standard cBus interface 303 (Fig 20). For more details on the standard cBus interface registers for the data cache controller 240 and cache 230, reference is made to pages B42 to B46 of Appendix B. The settings in these registers control the operation of the data controller 240. For the sake of simplicity only two of these registers are shown in Figure 153, i.e. base address and dcc mode.

Once the data cache controller 240 and data cache 230 are enabled, the data cache controller intially operates in the normal mode with all cache lines invalid. At the end of an instruction, the data cache controller 240 and cache 230 always reverts to the normal mode of operation. In all of the following modes except the "Invalidate" mode, there is an "Auto-fill and validate" option. By setting a bit in the dcccfg2 register, it is possible to fill the entire cache starting at the address stored in the base address register. During this operation, the data requests from the operand organizers B and C 247,248 are locked out until the operation is complete. The cache is validated at the end of this operation.

a. Normal Cache Mode In this mode, the two operand organizers supply the complete external memory addresses of the data requested. The address generator 1881 outputs the complete external memory addresses which are then checked independently using the internal tag memory 1872 to see that if the data requested is resident in the memory cache 230. If both requested data items are not in cache 230, data will be requested from the input interface switch 252. Round Robin scheduling will be implemented to service persistent simultaneous requests.

For simultaneous requests, if one of the data items is resident in cache, it will be S 25 placed on the least significant 32 bits of each requestor's data bus. The other data will be requested externally via the input interface switch.

b. The Single Output General Color Space Conversion Mode In this mode, the request comes from operand organizer B in the form of a 12-bit byte address. The requested data items are 8-bit color output values as previously discusied with reference to Fig. 60. The 12-bit address is fed to the indexpacket inputs of the address generators 1881 and the eight address generators 1881 generate eight different 32-bit complete external memory addresses of the format shown in figure 96. The bank, line and byte addresses of the generated complete addresses are determined in accordance with Table 12 and Fig. 61. The external memory address is interpreted as eight 9-bit line and byte addresses, which are used to address a byte from each of the eight banks of RAM. The cache is accessed to obtain the eight byte values from each bank which are returned to the operand organizers for subsequent interpolation by the main data path 242 in accordance with the principles previously discussed with reference to Fig. 60. As the single output color value table is able to fit I 1iMXL 147 entirely within the cache memory 230, it is preferable to load the entire single output color value table within the cache memory 230 prior to enabling the single color conversion mode.

c. Multiple Output General Color Space Conversion Mode In this mode, a 12-bit word address is received from operand organizer B 247.

The requested data items are 32-bit color output values as previously discussed with reference to Fig. 62. The 12-bit address is fed to the indexpacket inputs of the address generators 1881 and the eight address generators 1881 generate eight different 32-bit complete external memory addresses of the format shown in figure 96. The line and tag addresses of the complete external memory addresses are determined in accordance with table 12 and Fig. 63. The completed external memory address is interpreted as eight 9-bit addresses with the 9-bit address being decomposed into a 7-bit line address and a 2-bit tag address as discussed previously with reference to Fig. 63.

Upon the tag address not being found, the cache stalls while the appropriate data is loaded from the input interface switch 252 (Fig Upon the data being available, the output data is returned to the operand organizers.

d. JPEG Encoding Mode In this mode, the necessary tables for JPEG encoding and other operational subsets are stored in each bank of cache RAM. The storage of tables being previously described in the previous discussion of the JPEG encoding mode (Tables 14 and 16).

e. Slow JPEG Decoding Mode In this mode, the data is organized in accordance with Table 17.

f. Matrix Multiplication Mode In this mode, the cache is utilized to access 256 byte lines of data.

g. Disabled Mode In this mode, all requests are passed through to the input interface switch 252.

h. Invalidate Mode In this mode, the contents of the entire cache are invalidated by clearing all the line valid status bits.

3.18.1 Input Interface Switch Returning again to Fig. 2, the input interface switch 252 performs the function of arbitrating data requests from the pixel organizer 246, the data cache controller 240 and the instruction controller 235. Further, the input interface switch 252 transmits addresses and data as required to the external interface controller 238 and local memory controller 236.

The input interface switch 252 stores in one of its configuration register the base address or the memory object in the host memory map. This is a virtual address that must be aligned on a page boundary, hence 20 address bits are required. For each request made by the pixel organizer, data cache controller, instruction controller, the (O:\CISRA\STAR\MASTERJMSTRV I HXL 148 input interface switch 252 first subtracts the co-processor's base address bits from the most significant 6 bits of the start address of the data. If the result is negative, or the most significant 6 bits of the result are non-zero, this indicates that the desired destination is the PCI bus.

If the most significant 6 bits of the result are zero, this indicates that the data maps to a co-processor's memory location. The input interface switch 252 then needs to check the next 3 bits to determine if the co-processor's location is legal or not.

The legal co-processor's locations that may act as a source of data are: 1) 16 Mbytes occupied by the Generic interface, beginning at an offset of 0x01000000 from the co-processor's base address.

2) 32 Mbytes occupied by the local memory controller (LMC), starting at an offset of 0x02000000 from the base address of the co-processor's memory object.

Requests that map to an illegal co-processor's location are flagged as errors by the Input Interface Switch.

The PCI bus is the source of data corresponding to any addresses that map outside of the range occupied by the co-processor's memory object. An i-source signal is used by the input interface switch to indicate to the EIC whether requested data is to originate from the PCI bus or the Generic interface.

i After the address decoding process, legal requests are routed to the appropriate IBus interface when the bus is free. The EIC or LMC is busy with a data transaction to the input interface switch when they have their i-ack signal asserted. However, the input interface switch does not keep a count for the number of incoming words, and so must monitor the i-oe signal, controlled by the pixel organizer, instruction controller or data cache controller, in order to determine when the current data transaction has 25 completed.

The input interface switch 252 must arbitrate between three modules: the pixel organizer, data cache controller and instruction controller. All of these modules are o able to request data simultaneously, but not all requests can be instantly met since there are only two physical resources. The arbitration scheme used by the input interface switch' is priority-based and programmable. Control bits within a configuration register of the input interface switch specify the relative priorities of the instruction controller, data cache controller and pixel organizer. A request from the module with the lower priority is granted when neither of the other two modules are requesting access to the same resource as it is. Assigning the same priority to at least two of the requesters results in the use of a round robin scheme to deduce the new winners.

As immediate access to a resource may not be possible, the input interface switch needs to store the address, burst length and whether to prefetch data provided by each requester. For any given resource, the arbitration process only needs to determine a new winner when there is not an IBus transaction in progress.

IO:\CISRA\STAR\MASTER MSTRVI IIMNXL 149 Turning to Fig. 145, there is illustrated the instruction interface switch 252 in more detail. The switch 252 includes the standard CBus interface and register file 860 in addition to two IBus transceivers 861 and 862 between an address decoder 863 and arbiter 864.

The address decoder 863 performs address decoding operations for requests received from the pixel organizer, data cache controller and instruction controller. The address decoder 863 checks the address is a legal one and performs any address remapping required. The arbiter 864 decides which request to pass from one IBus transceiver 661 to a second IBus transceiver 862. Preferrably, the priority system is programmable.

The IBus transceivers 861, 862 contain all the necessary multiplexing/ demultiplexing and tristate buffering to enable communication over the various interfaces to the input interface switch.

3.18.8 Local Memory Controller Returning again to Fig. 2, the local memory controller 236 is responsible for all aspects of controlling the local memory and handling access requests between the local memory and modules within the co-processor. The local memory controller 236 responds to write requests from the result organizer 249 and read requests from the input interface switch 252. Additionally, it also responds to both read and write requests from the peripheral interface controller 237 and the usual global CBus input.

*The local memory controller utilizes a programmable priority system and further utilizes FIFO buffers to maximize throughput.

In the present invention, a multi-port burst dynamic memory controller is utilized in addition to using First-In-First-Out (FIFO) buffers to de-couple the ports 25 from a memory array.

Fig. 146 depicts a block diagram of a four-port burst dynamic memory controller according to a first embodiment of the present invention. The circuit includes two write ports (A 1944 and B 1946) and two read ports (C 1948 and D 1950) that require access to a memory array 1910. The data paths from the two write ports pass through separate FIFOs 1920, 1922 and to the memory array 1910 via a multiplexer 1912, while the data paths of the read ports 1948, 1950 pass from the memory array 1910 via separate FIFOs 1936, 1938. A central controller 1932 coordinates all port accesses as well as driving all the control signals necessary to interface to the dynamic memory 1910. A refresh counter 1934 determines when dynamic memory refresh cycles for the memory array 1910 are required and coordinates these with the controller 1932.

Preferably, the data is read from and written to the memory array 1910 at twice the rate that data is transferred from the write ports 1944, 1946 to the FIFOs 1920, 1922 or from the FIFOs 1936, 1938 to the read ports 1948, 1950. This results in [O:\CISRA\STAR\MASTERIMSTRVI IIMXL 150 as little time as possible being taken up doing transfers to or from the memory array 1910 (which is the bottleneck of any memory system) relative to the time taken to transfer data through the write and read ports 1944, 1946, 1948, 1950.

Data is written into the memory array 1910 via either one of the write ports 1944, 1946. The circuits connected to the write ports 1944, 1946 see only a .FIFO 1920, 1922 which are initially empty. Data transfers through the write ports 1944, 1946 proceed unimpeded until the FIFO 1920, 1922 is filled, or the burst is ended.

When data is first written into the FIFO 1920, 1922, the controller 1932 arbitrates with the other ports for the DRAM access. When access is granted, data is read out of the FIFO 1920, 1922 at the higher rate and written into the memory array 1910. A burst write cycle to DRAM 1910 is only initiated when a preset number of data words have been stored in the FIFO 1920, 1922, or when the burst from the write port ends. In either case, the burst to DRAM 1910 proceeds when granted and continue until the FIFO 1920, 1922 is emptied, or there is a cycle request from a higher priority port. In either event, data continues to be written into the FIFO 1920, 1922 from the write port without hindrance, until the FIFO is filled, or until the burst ends and a new burst is started. In the latter case, the new burst cannot proceed until the previous burst has been emptied from the FIFO 1920, 1922 and written to the DRAM 1910. In the former case, data transfers recommences as soon as the first word is read out of the FIFO 1920, 1922 and written to DRAM 1910. Due to the higher rate of data transfers out of the FIFO 1920, 1922, it is only possible for the write port 1944, 1946 to stall if Co..

o. the controller 1832 is interrupted with cycle requests from the other ports. Any interruption to the data transfers from the write ports 1944, 1946 to the FIFOs 1920, .1922 is preferably kept to a minimum.

The read ports 1948, 1950 operate in a converse fashion. When a read port 1948, 1950 initiates a read request, a DRAM cycle is immediately requested. When granted, the memory array 1910 is read and data is written into the corresponding FIFO 1936, 1938. As soon as the first data word is written into the FIFO 1936, 1938, it is available for read-out by the read port 1948, 1950. Thus there is an initial delay in obtaining the first datum word but after that there is a high likelihood that there are no further delays in retrieving the successive data words. DRAM reads will be terminated when a higher priority DRAM request is received, or if the read FIFO 1936, 1938 becomes full, or when the read port 1948, 1950 requires no more data. Once the read has been terminated in this way, it is not restarted until there is room in the FIFO 1936, 1938 for a preset number of data words. Once the read port terminates the cycle, any data remaining in the FIFO 1936, 1938 is discarded.

In order to keep DRAM control overheads to a minimum, rearbitration for the DRAM access is restricted so that bursts cannot be interrupted until a preset number of [O:\CI5RA\STAR\K4ASTERIMSTRV I HMXL 151 data words have been transferred (or until the corresponding write FIFO 1920, 1922 is emptied, or read FIFO 1936, 1938 is filled).

Each of the access ports 1944, 1946, 1948. 1950 has an associated burst start address which is latched in a counter 1942 at the start of the burst. This counter holds the current address for transactions on that port so that, should the transfer be interrupted, it can be resumed at any time at the correct memory address. Only the address for the currently active DRAM cycle is selected by multiplexer 1940 and passed on to the row address counter 1916 and column address counter 1918. The low order N bits of address are inputted to the column counter 1918 while the higher order address bits are inputted to the row counter 1916. Multiplexer 1914 outputs row addresses from the row counter 1916 to the memory array 1910 during the row address time of the DRAM and passes column addresses from the column counter 1918 during column address time of the DRAM. The row address counter 1916 and the column address counter 1918 are loaded at the start of any burst to the memory array DRAM 15 1910. This is true both at the start of a port cycle and at the continuation of an interrupted burst. The column address counter 1918 is incremented after each transfer to memory has taken place while the row address counter 1916 is incremented when the column address counter 1918 rolls over to a count of zero. When the latter happens, the burst must be terminated and restarted at the new row address.

In the preferred embodiment it is assumed that memory array 1910 comprizes 4 x 8 bit byte lines making up a 32 bits per word. Further there is associated with each write port 1944, 1946 a set of four byte write enable signals 1950, 1952 which individually allow data to be written to each 8-bit portion of each 32-bit data word in the memory array 1910. Since it is possible to arbitrarily mask the writing of data to 25 any byte within each word that is written to the memory array 1910, it is necessary to store the write enable information along with each data word in corresponding FIFOs 1926, 1928. These FIFOs 1926, 1928 are controlled by the same signals that control the write FIFOs 1920, 1922 but are only 4 bits wide instead of the 32 bits required for the write data in FIFOs 1920, 1922. In like fashion, multiplexer 1930 is controlled in the same manner as the multiplexer 1912. The selected byte write enables are inputted to the controller 1932 which uses the information to selectively enable or disable writing to the addressed word in the memory array 1910 in synchronization with the write data being inputted to the memory array 1910 by way of multiplexer 1912.

The arrangement of Fig. 146 operates under the control of the controller 1932.

Fig. 147 is a state machine diagram depicting the detail of operation of the controller 1932 of Fig. 146. After power up and at the completion of reset the state machine is forced into state IDLE 100 in which all DRAM control signals are driven inactive (high) and multiplexer 1914 drives row addresses to the DRAM array 1910. When a refresh or cycle request is detected, the transition is made to state RASDEL1 1962. On JO:\CISRA\STARASTERIMSTRV I HIML 152 the next clock edge the transition to state RASDEL2 1964 is made. On the next clock edge, if the cycle request and refresh have gone away, the state machine returns to state IDLE 1900, otherwize, when the DRAM tRP (RAS precharge timing constraint) period has been satisfied, the transition to state RASON 1966 is made at which time the row address strobe signal, RAS, is asserted low. After tRCD (RAS to CAS delay timing constraint) has been satisfied, the transition to state COL 1968 is made, in which the multiplexer 1914 is switched over to select column addresses for inputting to the DRAM array 1910. On the next clock edge the transition to state CASON 1970 is made and the DRAM column address strobe (CAS) signal is driven active low. Once the tCAS (CAS active timing constraint) has been satisfied, the transition to state CASOFF 1972 is made in which the DRAM column address strobe (CAS) is driven inactive high once again. At this point, if further data words are to be transferred and a higher priority cycle request or refresh is not pending or if it is too soon to rearbitrate anyway, and once the tCP (CAS precharge timing constraint) has been satisfied, the 15 transition back to state CASON 1970 will be made in which the DRAM column address strobe (CAS) is driven active low again. If no further data words are to be transferred, or if rearbitrating is taking place and a higher priority cycle request or refresh is pending, then the transition is made to state RASOFF 1974 instead, providing tRAS (RAS active timing constraint) and tCP (CAS precharge timing constraint) are both satisfied. In this state the DRAM row address strobe (RAS) signal is driven inactive high. On the next clock edge the state machine returns to state IDLE 1860 ready to start the next cycle.

When in state RASDEL2 1964 and a refresh request is detected, the transition will be made to state RCASON 1980 once tRP (RAS precharge timing constraint) has been satisfied. In this state DRAM column address strobe is driven active low to start a DRAM CAS before RAS refresh cycle. On the next clock edge the transition to state :RRASON 1978 is made in which DRAM row address strobe (RAS) is driven active low. When tCAS (CAS active timing constraint) has been met, the transition to state RCASOFF 1976 will be made in which DRAM column address strobe (CAS) is driven inactive high. Once tRAS (RAS active timing constraint) has been met, the transition to state RASOFF 1974 is made in which DRAM row address strobe (RAS) is driven inactive high effectively ending the refresh cycle. The state machine then continues as above for a normal DRAM cycle, making the transition back to state IDLE 1960.

The refresh counter 1934 of Fig. 146 is simply a counter that produces refresh request signals at a fixed rate of once per 15 microseconds, or other rate as determined by the particular DRAM manufacturer's requirements. When a refresh request is asserted, it remains asserted until acknowledged by the state machine of Fig. 147. This acknowledgement is made when the state machine enters state RCASON 1980 and remains asserted until the state machine detects the refresh request has been de-asserted.

(O:\CISRA\STAR\N I ASTERM5TRV I 1MXL

F

153 In Fig. 148, there is set out in pseudo code form, the operation of the arbitrator 1924 of Fig. 146. It illustrates the method of determining which of four cycle requesters is granted access to the memory array 1910, and also a mechanism for modifying the cycle requester priorities in order to maintain a fair access regime. The symbols used in this code are explained in Fig. 149.

Each requester has 4 bits associated with it that represent that requester's priority. The two high order bits are preset to an overall priority by way of configuration values set in a general configuration register. The two low order bits of priority are held in a 2-bit counter that is updated by the arbitrator 24. When determining the victor in an arbitration, the arbitrator 1924 simply compares the 4-bit values of each of the requesters and grants access to the requester with the highest value. When a requester is granted a cycle its low order 2-bit priority count value is cleared to zero, while all other requesters with identical high order 2-bit priority values and whose low order 2-bit priority is less than the victor's low order 2-bit priority have o 15 their low order 2-bit priority counts incremented by one. This has the effect of making a requester that has just been granted access to the memory array 1910 the lowest priority among requesters with the same priority high order 2-bit value. The priority low order 2-bit value of other requesters with priority high order 2-bit value different to see*.: that of the winning requester are not affected. The high order two bits of priority 20 determine the overall priority of a requester while the low order two bits instil a fair

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arbitration scheme among requesters with identical high order priority. This scheme allows a number of arbitration schemes to be implemented ranging from hard-wired fixed priority (high order two bits of each requester unique) through part rotating and part hard-wired (some high order 2-bit priorities different to others, but not all) to lOOO *25 strictly fair and rotating (all priority high order 2-bit fields the same).

Fig. 149 depicts the structure of the priority bits associated with each requester •and how the bits are utilized. It also defines the symbols used in Fig. 148.

In the preferred embodiment, the various FIFOs 1920, 1922, 1938 and 1936 are 32 bits wide and 32 words deep. This particular depth provides a good compromise between efficiency and circuit area consumed. However, the depth may be altered, with a corresponding change in performance, to suit the needs of any particular application.

Also, the four port arrangement shown is merely a preferred embodiment.

Even the provision of a single FIFO buffer between the memory array and either a read or write port will provide some benefits. However. the use of multiple read and write ports provides the greatest potential speed increase.

3.18.9 Miscellaneous Module The miscellaneous module 239 provides clock generation and selection for the operation of the co-processor 224, reset synchronization, multiplexing of error and I iMXL 154 interrupt signals by routing of internal diagnostic signals to external pins as required, interfacing between the internal and external form of the CBus and multiplexing of internal and generic Bus signals onto a generic/external CBus output pins. Of course, the operation of the miscellaneous module 239 varies in accordance with clocking requirements and implementation details depending on the ASIC technology utilized.

3.18.10 External Interface Controller The following described apsects of the invention relate to a method and an apparatus for providing virtual memory in a host computer system having a coprocessor that shares the virtual memory. The embodiments of the invention seek to provide a co-processor able to operate in a virtual memory mode in conjunction with the host processor.

In particular, the co-processor is able to operate in a virtual memory mode of the host processor. The co-processor includes a virtual-memory-to-physical-memory mapping device that is able to interrogate the host processor's virtual memory tables, so .00 15 as to map instruction addresses produced by the co-processor into corresponding ophysical addresses in the host processor's memory. Preferably, the virtual-memory-to- 0: physical-memory mapping device forms part of a computer graphics co-processor for oo:iOO the production of graphical images. The co-processor may include a large number of modules able to form various complex operations on images. The mapping device is responsible for the interaction between the co-processor and the host processor.

off* O*o° The external interface controller (EIC) 238 provides the co-processors 6000o interface to the PCI Bus and to a generic Bus. It also provides memory management to translate between the co-processor's internal virtual address space and the host system physical address space. The external interface controller 238 acts as a master on the ooo 25 PCI Bus when reading the data from the host memory in response to a request from the input interface switch 252 and when writing data to host memory in response to a 00:a s 0request from the result organizer 249. The PCI Bus access is implemented in 0050 0accordance the well known standard with "PCI Local Bus specification, draft PCI special interest group, 1994.

1The external interface controller 238 arbitrates between simultaneous requests for PCI transactions from the input interface switch 252 and the result organizer 249.

The arbitration is preferably configurable. The types of requests received include transactions for reading less than one cache line of the host co-processor at a time, reading between one and two cache lines of the host and reading two or more cache lines of the host. Unlimited length write transactions are also implemented by the external interface controller 238. Further, the external interface controller 238 optionally also performs prefetching of data.

The construction of the external interface controller 238 includes a memory management unit which provides virtual to physical address mapping of host memory [O:\CISR-ASTTARWASTERIMSTRV I INIXL 155 accesses for all of the co-processor's internal modules. This mapping is completely transparent to the module requesting the access. When the external interface controller 238 receives a request for host memory access, it initiates a memory management unit operation to translate the requested address. Where the memory management unit is Sunable to translate the address, in some cases this results in one or more PCI Bus transaction to complete the address translation. This means that the memory management unit itself can be another source of transaction requests on the PCI Bus. If a requested burst from the input interface switch 252 or results organizer 249 crosses the boundary of a virtual page, the external interface controller 238 automatically generates a memory management unit operation to correctly map all virtual addresses.

The memory management unit (MMU) (915 of Fig. 150) is based around a 16 entry translation look aside buffer (TLB). The TLB acts as a cache of virtual to physical address mappings. The following operations are possible on the TLB: 1) Compare: A virtual address is presented, and the TLB returns either the 5I corresponding physical address, or a TLB miss signal (if no valid entry matches the address).

2) Replace: A new virtual-to-physical mapping is written into the TLB, replacing an existing entry or an invalid entry.

3) Invalidate: A virtual address is presented; if it matches a TLB entry, that entry is marked invalid.

4) Invalidate All. All TLB entries are marked invalid.

Read: A TLB entry's virtual or physical address is read, based on a four bit address. Used for testing only.

S.6) Write: A TLB entry's virtual and physical address is written, based on a four bit address.

Entries within the TLB have the format shown in Fig. 151. Each valid entry consists of a 20-bit virtual address 670, a 20-bit physical address 671, and a flag which indicates whether the corresponding physical page is writable. The entries allow for page sizes as small as 4kB. A register in the MMU can be used to mask off up to bits of the addresses used in the comparison. This allows the TLB to support pages up to 4MB. As there is only one mask register, all TLB entries refer to pages of the same size.

The TLB uses a "least-recently-used" (LRU) replacement algorithm. A new entry is written over the entry which has the longest elapsed time since it was last written or matched in a comparison operation. This applies only if there are no invalid entries; if these exist, they are written to before any valid entries are overwritten.

Fig. 152 shows the flow of a successful TLB compare operation. The incoming virtual address 880 is divided into 3 parts 881 883. The lower 12 bits 881 are always part of the offset inside a page and so are passed directly on to the I HNIXL 156 corresponding physical address bits 885. The next 10 bits 882 are either part of the offset, or part of the page number, depending on the page size, as set by the mask bits.

A zero in the mask register 887 indicates that the bit is part of the page offset, and should not be used for TLB comparisons. The 10 address bits are logically "ANDED" with the 10 mask bits to give the lower 10 bits of the virtual page number 889 for TLB lookups. The upper 10 bits 883 of the virtual address are used directly as the upper bits of the virtual page number 889.

The 20-bit virtual page number thus generated is driven into the TLB. If it matches one of the entries, the TLB returns the corresponding physical page number 872, and the number of the matched location. The physical address 873 is generated from the physical page number using the mask register 887 again. The top 10 bits of physical page number 872 are used directly as the top 10 bits of the physical address 873. The next 10 bits of physical address 872 are chosen 875 from either the physical page number (if the corresponding mask bit is or the virtual address (if the mask bit is The lower 12 bits 885 of physical address come directly from the virtual address.

Finally, following a match, the LRU buffer 876 is updated to reflect the use of the matched address.

A TLB miss occurs when the input interface switch 252 or the results organizer 249 requests an access to a virtual address which is not in the TLB 872. In this case, the MMU must fetch the required virtual-to-physical translation from the page table in host memory 203 and write it into the TLB before proceeding with the requested access.

The page table is a hash table in the hosts main memory. Each page table S entry consists of two 32-bit words, with the format shown in Fig. 153. The second word comprizes the upper 20 bits for the physical address and the lower 12 bits are reserved. The upper 20 bits of the corresponding virtual address are provided in the first word. The lower 12 bits include a valid bit and writable or a "read-only bit, with the remaining 10 bits being reserved.

The page table entry contains essentially the same information as the TLB entry.' Further flags in the page table are reserved. The page table itself may be, and typically is, distributed over multiple pages in main memory 203, which in general are contiguous in virtual space but not physical space.

The MMU contains a set of 16 page table pointers, setup by software, each of which is a 20-bit pointer to a 4kB memory region containing part of the page table.

This means the co-processor 224 supports a page table 64kB in size, which holds 8k page mappings. For systems with a 4kB page size, this means a maximum of 32MB of mapped virtual address space. Preferably, the page table pointers always reference a 4kB memory region, regardless of the page size used in the TLB.

[O:\CISPA\STAR\\IASTERMSTRV I HMXL 157 The operation of the MMU following a TLB miss is shown 690 in Fig. 154, as d follows: 1. Execute the hash function 892 on the virtual page number 891 that missed in the TLB, to produce a 13-bit index into the page table.

2. Use the top 4 bits 894 of the page table index 894, 896 to select a page table pointer 895.

3. Generate the physical address 890 of the required page table entry, by concatenating the 20-bit page table pointer 895 with the lower 9 bits of the page table index 896, setting the bottom 3 bits to 000 (since page table entries occupy 8 bytes in host memory).

4. Read 8 bytes from host memory, starting at the page table entry physical address 898.

When the 8-byte page table entry 900 is returned over the PCI bus, the virtual page number is compared to the original virtual page number that caused the TLB miss, provided that the VALID bit is set to 1. If it does not match, the next page table entry is fetched (incrementing the physical address by 8 bytes) using the process described above. This continues until a page table entry with a matching virtual page number is found, or an invalid page table entry is found. If an invalid page table entry is found, a page fault error is signalled and processing stops.

6. When a page table entry with a matching virtual page number is found, the complete entry is written into the TLB using the replace operation. The new entry is placed in the TLB location pointed to by the LRU buffer 876.

The TLB compare operation is then retried, and will succeed, and the originally requested host memory access can proceed. The LRU buffer 876 is updated when the new entry is written into the TLB.

The hash function 892 implemented in the EIC 238 uses the following equation on the 20 bits of virtual page number (vpn): index ((vpn> >S 1 XOR (vpn> >S 2 )XOR(vpn> >S 3 Oxlfff; where s 1 s2 and S 3 are independently programmable shift amounts (positive or negative), each of which can take on four values.

If the linear search through the page table crosses a 4kB boundary, the MMU automatically selects the next page table pointer to continue the search at the correct physical memory location. This includes wrapping around from the end of the page table to the start. The page table always contains at least one invalid (null) entry, so that the search always terminates.

Whenever the software replaces a page in host memory, it must add a page table entry for the new virtual page, and remove the entry corresponding to the page that has been replaced. It must also make sure that the old page table entry is not 1O:\CISRA\STAR\MASTER]MSTRV I HMXL 158 cached in the TLB on the co-processor 224. This is achieved by performing a TLB O invalidation cycle in the MMU.

An invalidation cycle is performed via a register write to the MMU, specifying the virtual page number to be invalidated, along with a bit that causes the invalidation operation to be done. This register write may be performed directly by the software, or via an instruction interpreted by the Instruction Decoder. An invalidation operation is performed on the TLB for the supplied virtual page number. If it matches a TLB entry, that entry is marked invalid, and the LRU table updated so that the invalidated location is used for the next replace operation.

A pending invalidate operation has priority over any pending TLB compares.

When the invalidate operation has completed, the MMU clears the invalidate bit, to signal that it can process another invalidation.

If the MMU fails to find a valid page table entry for a requested virtual address, this is termed a page fault. The MMU signals an error, and stores the virtual address that caused the fault in a software accessible register. The MMU goes to an idle state and waits until this error is cleared. When the interrupt is cleared, the MMU resumes from the next requested transaction.

A page fault is also signalled if a write operation is attempted to a page that is (not marked writable) marked read only.

The external interface controller (EIC) 238 can service transaction requests from the input interface switch 252 and the result organizer 249 that are addressed to the Generic bus. Each of the requesting modules indicates whether the current request is for the Generic Bus or the PCI bus. Apart from using common buses to communicate with the input interface switch 252 and the results organizer 249. the EIC's operation for Generic bus requests is entirely separate from its operation for PCI requests. The EIC 238 can also service CBus transaction types that address the Generic bus space directly.

Fig. 150 shows the structure of the external interface controller 238. The IBus requests pass through a multiplexer 910, which directs the requests to the appropriate internal module, based on the destination of the request (PCI or Generic Bus).

Requests to the Generic bus pass on to the generic bus controller 911, which also has RBus and CBus interfaces. Generic bus and PCI bus requests on the RBus use different control signals, so no multiplexer is required on this bus.

IBus requests directed to the PCI bus are handled by an IBus Driver (IBD) 912. Similarly, an RBus Receiver (RBR) 914 handles the RBus requests to PCI. Each of the IBD 912 and RBR 914 drive virtual addresses to the memory management unit (MMU) 915, which provides physical addresses in return. The IBD, RBR and MMU can each request PCI transactions, which are generated and controlled by the PCI [O:\CISRA\STARWASTERJMSTR' I iiMXL 159 master mode controller (PMC) 917. The IBD and the MMU request only PCI read transactions, while the RBR requests only PCI write transactions.

A separate PCI Target Mode Controller (PTC) 918 handles all PCI transactions addressed to the co-processor as a target. This drives CBus master mode signals to the instruction controller, allowing it to access all other modules. The PTC passes returned CBus data to be driven to the PCI bus via the PMC, so that control of the PCI data bus pins comes from a single source.

CBus transactions addressed to EIC registers and module memory are dealt with by a standard CBus interface 7. All submodules receive some bits from control registers, and return some bits to status registers, which are located inside the standard CBus interface.

Parity generation and checking for PCI bus transactions is handled by the parity generate and check (PGC) module 921, which operates under the control of the PMC and PTC. Generated parity is driven onto the PCI bus, as are parity error signals. The results of parity checking are also sent to the configuration registers section of the PTC for error reporting.

o• ~Fig. 155 illustrates the structure of the IBus driver 912 of Fig. 150. Incoming IBus address and control signals are latched 930 at the start of a cycle. An or-gate 931 detects the start of the cycle and generates a start signal to control logic 932. The top address bits of the latch 930, which form the virtual page number, are loaded into a counter 935. The virtual page number is passed to the MMU 915 (Fig. 150) which returns a physical page number which is latched 936.

The physical page number and the lower virtual address bits are recombined according to the mask 937 and form the address 938 for PCI requests to the PMC 717 (Fig. 102). The burst count for the cycle is also loaded into a counter 939. Prefetch operations use another counter 941 and an address latch and compare circuit 943.

Data returned from the PMC is loaded into a FIFO 944, along with a marker which indicates whether the data is part of a prefetch. As data becomes available at the front of the FIFO 944, it is clocked out by the read logic via synchronization latches 945,946. The read logic 946 also generates the IBus acknowledge signal.

A central control block 932. including state machines, controls the sequencing of all of the address and data elements, and the interface to the PMC.

The virtual page number counter 935 is loaded at the start of an IBus transaction with the page number bits from the IBus address. The top 10 bit of this bit counter always come from the incoming address. For the lower 10 bits, each bit is loaded from the incoming address if the corresponding mask bit 937 is set to 1: otherwize, the counter bit is set to 1. The 20-bit value is forwarded to the MMU interface.

[O:\CISRA\STAR\MASTER]MSTRV I HMXL 160 In normal operation the virtual page number is not used after the initial address translation. However, if the IBD detects that the burst has crossed a page boundary, the virtual page counter is incremented, and another translation is performed. Since the low order bits that are not part of the virtual page number are set to 1 when the counter is loaded, a simple increment on the entire 20-bit value always causes the actual page number field to increment. The mask bits 937 are used again after an increment to set up the counter for any subsequent increments.

The physical address is latched 936 whenever the MMU returns a valid physical page number after translation. The mask bits are used to correctly combine the returned physical page number with the original virtual address bits.

The physical address counter 938 is loaded from the physical address latch 936. It is incremented each time a word is returned from the PMC. The count is monitored as it increments, to determine whether the transaction is about to cross a page boundary. The mask bits are used to determine which bits of the counter should IS be used for the comparison. When the counter detects that there are two or less words remaining in the page, it signals the control logic 932. which the terminates the current PCI request after two more data transfers, and requests a new address translation if :required. The counter is reloaded after the new address translation, and PCI requests resumed.

The burst counter 939 is a 6-bit down counter which is loaded with the IBus burst value at the beginning ofa transaction. It is decremented every time a word is returned from the PMC. When the counter value is two or less, it signals to the control logic 932, which can then terminate the PCI transaction correctly with two more data transfers (unless prefetching is enabled).

The prefetch address register 943 is loaded with the physical address of the first word of any prefetch. When the subsequent IBus transaction starts, and the prefetch counter indicates that at least one word was successfully prefetched, the first physical address of the transaction is compared to the value in the prefetch address latch. If it matched, the prefetch data is used to satisfy the IBus transaction, and any PCI transaction requests start at the address after the last prefetched word.

The prefetch counter 941 is a four bit counter which is incremented whenever a word is returned by the PMC during a prefetch operation, up to a maximum count equal to the depth of the input FIFO. When the subsequent IBus transaction matches the prefetch address, the prefetch count is added to the address counter, and subtracted from the burst counter, so that PCI requests can start at the required location.

Alternatively, if the IBus transaction only requires some of the prefetched data, the requested burst length is subtracted from the prefetch count, and added to the latched prefetch address, and the remaining prefetch data is retained to satisfy further requests.

IO:\CISRA\STAR\MASTERIMSTRV I HMXL 161 The Data FIFO 944 is a 8 word by 33 bit asynchronous fall through FIFO.

Data from the PMC is written into the FIFO, along with a bit indicating whether the data is part of a prefetch. Data from the front of the FIFO is read out and driven onto the IBus as soon as it becomes available. The logic that generates the data read signals operates synchronously to clk, and generates the IBus acknowledge output. If the transaction is to be satisfied using prefetched data, signals from the control logic tell the read logic how many words of prefetched data should be read out of the FIFO.

Fig. 156 illustrates the structure of the RBus Receiver 914 of Fig. 150.

Control is split between two state machines 950, 951. The Write state machine 951 controls the interface to the RBus. The input address 752 is latched at the start of an RBus burst. Each data word of the burst is written in a FIFO 754, along with its byte enables. If the FIFO 954 become full r-ready is deasserted by the write logic 951 to prevent the results organiser from attempting to write any more words.

The write logic 951 notifies the main state machine 950 of the start of an RBus 15 burst via a resynchronized start signal to prevent the results organizer from trying to write any more words. The top address bits, which form the virtual page number, are loaded into a counter 957. The virtual page number is passed to the MMU, which returns a physical page number 958. The physical page number and the lower bits of the virtual address are recombined according to the mask, and loaded into a counter 960, to provide the address for PCI requests to the PMC. Data and byte enables for each word of the PCI request are clocked out of the FIFO 954 by the main control logic 950, which also handles all PMCM interface control signals. The main state machine indicates that it is active via a busy signal, which is resynchronized and returned to the write state machine.

The write state machine 951 detects the end of an RBus burst using r-final. It stops loading data into the FIFO 954, and signals the main state machine that the RBus burst has finished. The main state machine continues the PCI requests until the Data FIFO has been emptied. It then deasserts busy, allowing the write state machine to start the next RBus burst.

Returning to Fig. 150, the memory management unit 915 is responsible for translating virtual page numbers into physical page numbers for the IBus driver (IBD) 912 and the RBus receiver (IBR) 914. Turning to Fig. 157, there is illustrated the memory management unit in further detail. A 16 entry translation lookaside buffer (TLB) 970 takes its inputs from, and drives its outputs to, the TLB address logic 971.

The TLB control logic 972, which contains a state machine, receives a request, buffered in the TLB address logic, from the RBR or IBD. It selects the source of the inputs, and selects the operation to be performed by the TLB. Valid TLB operations are compare, invalidate, invalidate all, write and read. Sources of TLB input addresses are the IBD and RBR interfaces (for compare operations), the page table entry buffer (O:\CISA\STAR\MASTIBRINITRV I HIIXL 162 O 974 (for TLB miss services) or registers within the TLB address logic. The TLB returns the status of each operation to the TLB control logic. Physical page numbers from successful compare operations are driven back to the IBD and RBR. The TLB maintains a record of its least recently used (LRU) location, which is available to the TLB address logic for use as a location for write operations.

When a compare operations fails, the TLB control logic 972 signals the page table access control logic 976 to start a PCI request. The page table address generator 977 generates the PCI address based on the virtual page number, using its internal page table pointer registers. Data returned from the PCI request is latched in the page table entry buffer 974. When a page table entry that matches the required virtual address is found, the physical page number is driven to the TLB address logic 977 and the page table access control logic 976 signals that the page table access is complete. The TLB control logic 972 then writes the new entry into the TLB, and retries the compare operation.

Register signals to and from the SCI are resynchronized 980 in both directions.

*The signals go to and from all other submodules. A module memory interface 981 decodes access from the Standard CBus Interface to the TLB and page table pointer •memory elements. TLB access are read only, and use the TLB control logic to obtain the data. The page table pointers are read/write, and are accessed directly by the module memory interface. These paths also contain synchronization circuits.

3.18.11 Peripheral Interface Controller Turning now to Fig. 158, there is illustrated one form of peripheral interface controller (PIC) 237 of Fig. 2 in more detail. The PIC 237 works in one of a number of modes to transfer data to or from an external peripheral device. The basic modes are: Video output mode. In this mode, data is transferred to a peripheral under the control of an external video clock and clock/data enables. The PIC 237 drives output clock and clock enable signs with the required timing with respect to the output data.

2) Video input mode. In this mode, data is transferred from a peripheral under the control of an external video clock and data enable.

3) Centronics mode. This mode transfers data to and from the peripheral according to the standard protocol defined in IEEE 1284 standard.

The PIC 237 decouples the protocol of the external interface from the internal data sources or destination in accordance with requirements. Internal data sources write data into a single stream of output data, which is then transferred to the external peripheral according to the selected mode. Similarly, all data from an external peripheral is written into a single input data stream, which is available to satisfy a requested transaction to either of the possible internal data destinations.

[O:\CISL\STAR\MASTER]MSTRV I IMXL 163 There are three possible sources of output data: the LMC 236 (which uses the S ABus), the RO 249 (which uses the RBus), and the global CBus. The PIC 237 responds to transactions from these data sources one at a time a complete transaction is completed from one source before another source is considered. In general, only one source of data should be active at any time. If more than one source is active, they are served with the following priority CBus, then ABus, then RBus.

As usual, the module operates under the control of the standard CBus interface 990 which includes the PIC's internal registers.

Further, a CBus data interface 992 is provided for accessing and controlling peripheral devices via the co-processor 224. An ABus interface 991 is also provided for handling memory interactions with the local memory controller. Both the ABus interface 991 and CBus data interface 992 in addition to the result organizer 249 send data to an output data path 993 which includes a byte wide FIFO. Access to the output data path is controlled by an arbiter which keeps track of which source has priority or ownership of the output stream. The output data path in turn interfaces with V .a video output controller 994 and centronics control 997 depending on which of these is enabled. Each of the modules 994, 997 reads one byte at a time from the output data .path's internal FIFO. The centronics controller 997 implements the centronics data interfacing standard for controlling peripheral devices. The video output controller 20 includes logic to control output pads according to the desired video output protocols.

Similarly, a video input controller 998 includes logic to control any implemented video input standard. The video input controller 998 outputs to an input data path unit 999 S. which again comprizes a byte wide input FIFO with data being written into the FIFO asynchronously, one byte at a time, by either the video input controller 998 or centronics controller 997.

A data timer 996 contains various counters utilized to monitor the current state of FIFO's within output data paths 993 and input data path 999.

It can be seen from the foregoing that the co-processor can be utilized to execute dual streams of instructions for the creation of multiple images or multiple portiofis of a single image simultaneously. Hence, a primary instruction stream can be utilized to derive an output image for a current page while a secondary instruction stream can be utilized, during those times when the primary instruction stream is idle, to begin the rendering of a subsequent page. Hence, in a standard mode of operation, the image for a current page is rendered and then compressed utilising the JPEG coder 241. When it is required to print out the image, the co-processor 241 decompresses the JPEG encoded image, again utilising the JPEG coder 241. During those idle times when no further portions of the JPEG decoded image are required by an output device, instructions can be carried out for the compositing of a subsequent page or band. This process generally accelerates the rate at which images are produced due to the overlap IO:\CISRA\STAR\MASTERMSTRV I I4MXL 164 operating of the co-processor. In particular, the co-processor 224 can be utilized to substantial benefit in the speeding up of image processing operations for printing out by a printer attached to the co-processor such that rendering speeds will be substantially increased.

It will be evident from the foregoing that discussion of the preferred embodiment refers to only one form of implementation of the invention and modifications, obvious to those skilled in the art, can be made thereto without departing from the scope of the invention.

o S* e 165' Appendix A: The Coprocessor Microprogramming This section details the actions performed internally in the coprocessor each time a new instruction is executed. All self-configuration carried out by the coprocessor during instruction execution is performed via internal register reads and writes, consequently the coprocessor can be fully microprogrammed via the Exterral Cbus Interface or by the host via the PCIbus Interface. Note that microprogramming via the host interface will typically be very difficult due to the problems of synchronising the host.

In this Section it is assumed that the reader is familiar with the coprocessor's: 1. execution model, 2. instruction set and its coding, 3. register set, 4. and internal structure,.

A.1 General Notes A.1.1 General CoprocessorSetup Principles For all instructions other than Control Instructions and Local DMA Instructions, the data flow through the coprocessor is fundamentally under the control of the Pixel Organiser. The Pixel Organiser is responsible for fetching the prima.r input stream of data, for counting this flow of data and for determining when the final piece of data has been fetched. Generally speaking, the other modules within the coprocessor simply respond to data sent to them.

.A.1.2 Module Configuration Order Not all modules are set up for every instruction. Some modules are never configured in the course of instruction decoding. The order that mocules are configured is always the same and is PO, DCC, OOB, OOC, MDP, JC, RO, PIC.

i.o A.1.3 Setting miscellaneous registers If an instruction is encoded to include the setting of a register value, then that register is set during microprogramming in sequence defined by the following rules: 1. If the register to be set is in a module that would otherwise not have any registers set, then that register is set prior to any other register settings 2. If the register to be set is in a module that will have other registers set, then the extra register is set after other registers but immediately prior to that module's cfg register.

A.1.4 Inconsistent Instruction Operand Coding Many instructions have implied data types for operands and results, with other data types producing meaningless output. For each of the operands, the coprocessor determines the intended format using the following procedure: 1. if the internal format of the operand is specified to be one of pixels, packed bytes or unpacked bytes, then the corresponding Operand Organiser will be set up to reflect this.

The Data Cache Controller will not be configured and will thus continue to operate in "normal" mode.

2. if the internal format of the operand is specified to be "other" then the coprocessor will derive the format of the operand from the instruction. For Operand B and Operand C, this is straight forward. For Operand A there is no naturally implied "other" format, and the coprocessor's behaviour is undefined. The corresponding Operand Organiser will be left in bypass mode, and the Data Cache Controller will be set up to manage the operand data in the derived format.

Microprogramming is reasonably onhogonal split between the various modules.

Pseudocode syntax The sequence of operations is given by the numbers in the left margin.

Register names are in helvetica bold.

Register fields are denoted register.field I, D Instruction word and Data word respectively of instruction currently being decoded A, B and C A Operand word, B Operand word and C Operand word of instruction currently being decoded A_descriptor, B_descriptor and Cdescriptor A descriptor, B descriptor and C descriptor of Data Word of instruction currently being decoded R Result word of instruction currently being decoded S"x: Y" X concatenated with Y the coprocessor register number X "Cbus(X)" do CBus operation X "*Cbus data received from CBus read operation X virtual memory location X unknown value, yet to be determined "set" refers to the setting of the Data Manipulation Registers.

A.2 Compositing Operators Notes 1. Major opcode OxC and OxD 2. Opacity is considered to be the byte of highest address i.e. is the most significant byte.

3. Either the accumulator or the operand my be pre-multiplied 4. Result may be un-pre-multiplied 5. Instruction length is defined in terms of the number of input pixels 9* 9 9 *99*

S

S. 9 0 9. 9 C. S *99* 99** Pixel Organiser: if I.R=0 then 1. po_len 0x0000:l.length endif if A_descriptor.S=O then 2. po_dmr set endif 3. po_said R 4. po_cfg.mode sequential po_cfg.dst mdp set going DCC in "normal32" mode (default) Operand Organiser B: if B_descriptor.lf other then oob_len polen if B_descriptor.S= 0 then 6. oobdmr set endif 7. oob said A if B_descriptor.what tile 8. oobtile B endif not blend special for compositing ILl- 9. oobcfg.operate operate endif -Operand Organiser C -There is no implied other data t:ype for this -bo used to specify any bit offset in a bit map attenuation if C -descriptor.if other then ooc_len polen set up the ooc-drr if C-descritor.S 0 then 11. ooc-dmnr set including bo endif 12. ooc said C 13. OOC-cfg.operate operate endif Main Data Path: if B -descriptor.lf other then blend 14. mdplen polen mdp-bm B 16. mdp-bl A end if see.

see*17. mndp_cfg.instruction Lopcode rn* dpcg.blendgen (Bdescriptor.if =o-:her) mdp cfg.decode 1 mndpcfg.operate 1 -Result Organiser: if R -descritpor.S 0 then 18. ro dmnr set endif 19. ro sa R ro-,cfg.mode sequential :A.3 Colour Space Conversion Notes 1. Input space is always three dimensions. By default this is the three least significant channels of the pixel the opacity is the one thrown away.

2. The colour table format is one of two types: containing either one output channel or four output channels.

Pixel Organiser: -Operand A only makes sense as source pixels, anything else is probably wrong if L.R 0 then 1. po_len OxOOO:l.len endif if A-descriptor.S 0 then 2. po_dmr set endif 3. po -said A 4. PomuV C i F tables po -cfg.mode CSC pocfg.dst mdp -DCC setup: -should be other if 8B-descriptor.if other then 6. dcc addr B 7. dcc cfg2.cache -miss -inst B_descriptor.C if L.M 0 then single output channel dcc Cfg2.mode single char.j-el Csc else dcc cfg2.mode multi channel CSC endif endif operand Organiser B: -Operand B should be other, anyzhing else is probably -wrong but do it anyway if B -descriptor.if other then 8. oob-len pa ten if B-descriptor.S 0 then 9. oob-dmr set endif aob said B S...~cgoert prt endif se Operand Orcaniser

C:

Operand C should be other, anv.-:hing else is probably wrong but do it an%"aay f C C descriptor.if other then 12. ooc_len po -len if C~descriptor.S 0 then 13. ooc dmr set see. endif 14. ooc said C :15. 0cccfg.operate operate -Main Data Path: 16. mdpcqfg.instruction ILopcode 0Omdpcfg.decode 1 mdpcfg.operate 1 -Result Organiser: if R-descriptor.S 0 then 17. ro dmr set endif 18. ro-sa R 19. ro--cfg.mode sequential A.4 JPEG Instructions Notes I. Opcode =Ox2 2. Operand C may be a register to set 3. Optionis are miany: 0~c subsampling or not fihtering, or not 1, 3,or 4scan 4. Thiese instructions rely on several registers to be set up prior to dhe istruction being cxccuted.

A.4.1 Decompression Notes 1. The followving registers should be set prior to this instruction being executed: ro idr: output image dimensions register ro-cut: output cut register ro-lint: output limit register -if there is a register set targeted at anything other than -the JC, P0, RO or DCC if (D.R 1) and (C-descriptor.topnibble x5,.0x6,0x9 or OxB) then 0. @C descriptor C endif -Pixel Organiser: -Operand A is the source compressed data, and should be a byte stream if 1.11 0 then 1. po_len OxOOO:l.len endif if A-descriptor.S 0 then 2. po_dmr set endif 3. pa said A -if there is a register set targeted at P0 if (D.R 1) and (Cdcescriptor.topnibble 0x6) then en@iCdescriptor C po cg.mode sequential po-cfg.dst jc -DCC setup: B-descriptor.if other then 6. dcc addr B if there is a register set targeted at DCC if (13.11 1) and Cdescri ptor.top nibble 0x5) then 7. @C-descriptor C endif 8. dcc-cfg2.C B_descriptor.C dcc cfg2.mode JPEG decode end if -Operand Organiser B: -Operand B should be other, anything else is probably -wrong, but do it anyway if B-descriptor.if other then 9. oob-ten po-len if B_descriptor.S 0 then oob-dmnr set endi f 1-70 1. oob-said B 12. oobcfg.operate operate endif -operand Organiser C: -Operand C may be a register to set. If it isn't it should -be other, anything else is protably wrong, but do it anyway if (R.D 0) and (Cdescriptor.if c:Yer) then 13. ooc_len po len if C_descriptor.S 0 then 14. ooc-dmr set endif ooc-said C ooccfg.operate operate endif -JC setup: -if there is a register set tarceted at jc if (D.R 1) and (Cdescriptor.topnibble x9) then 16. @C escriptor C endif 17. jc-cfg.lnstruction I opcode jc cfg.decode 1 jc cfg.operate 1 -Result Organiser: if R -descriptor.S 0 then 18. ro-dmr set endif -if there is a register wrize targeted at RO 19. ro sa R if (D.R 1) and (Cdescriptor.topnibble OxB) then @C -descriptor C endif :21. ro-cfg.mode jpeg ro-cfg.chan L.M:1.4 rocfg.upsample L.S rocfg.cut :ro-cfg.limit L.T A.4-2 Compression' Notes 1. The followingy registers should be set prior to this instruction being executed: poidr: output image dimensions register jcrml: restart marker interval to_cut: output cut register to _int: output limit register -if there is a register set tarceted at anything other than -the JC, PO,-RO or DCC if (D.R 1) and (Cdescrl pto.top nibble !=0x5..0x6,0x9 or OxB) then 0. @Cdescriptor C endif Pixel Organiser: 1,71 -Operand A is the source compressed data, and should bea -byte stream if 1.13 0 then 1. palen OxOOOO:l.Ien endif if A -descriptor.S 0 then 2. pa-dmr set endif 3. pa said A if there is a register set targeted at PO if (D.R 1) and (Cdescriptor.topnibble 0x6) then 4. QCdescriptor C endif pocfg.mode jpeg pocfg.dst jc pocfg.SS LS subsampling pocfg.chan I.M:I.4 pocfg.F L.F DCC setup: if B -descriptor.if other then 6. dcc addr B -if there is a register set targeted at DCC if (D.R 1) and (Cdescriptor.topnibble 0x5) then @C-descriptor C endif 8. dcc -cfg2.cache miss inst B_descriptor.C dcc cfg2.mode JPEG encode end if -Operand Organiser B: Operand B should be other, anything else is probably -wrong, but do it anyway if B-descriptor.if other then oobjlen pa t en if Bjdescriptor.S 0 then oob-dmr set endif *11. aob said B 12. oob_cfg.operate operate endif -Operand Organiser C: -Operand C may be a register to set. If it isn't it should -be other, anything else is probably wrong, but do it -anyway if (R.D 0) and (Cfiescripto.if !=other) then 13. .ooc_len pojen if C_descriptor.S 0 then 14. ooc-dmr set endif ooc said C 16. ooccfg.operate operate endif -JPEG Coder: -if there is a register set targeted at JC if (D.R 1) and (Cdescrptor.topnlbble 0x9 then 17. @Q-descriptor C endif 18. jc_cfg.instruction l.opcode jccfg.decode 1 jccfg.operate 1 -Result Organiser: if Rdescriptor.S 0 then 19. ro dmr set end if ro-sa R if there is a register write targeted at RO if (D.R 1) and (Cdescriptor.topnibble OxB) then 21. @0 descriptor C endif 22. ro-cfg.mode sequential rocfg.cut L.0 rocfg.limit L.T Data Coding Notes 1. All data coding operations, whether compressing or decompressing are dealt with in the same way. Setting up for these operations looks very similar to that for JPEG.

2. Possible encoding operations are: *huffman encode predictive encode 3. Possible decoding operations are: fast huffrnan decode .slow huffman decode packbits decoding (version A) packbits decoding (version B) predictive decode Operand C may be a register to set The following registers may be required to be set prior to this instruction beingy executed: ro-cut output cut register ro .jmt: output limit register -if there is a register set targeted at anything other than -the JC, PO, RO or DCC if (D.R and (Cdescriptor.topnibble =0x5,0x6,0x9 or OxB) then 0. @Cdescriptor C endif -Pixel organiser: -'Operand A is the source data if I.R 0 then 1. po_len 0x0000:I.len endif if A-descriptor.S 0 then 2. po_dmr set endif 3. p0 said A if there is a register set targeted at PO if (D.R 1) and (Cdescrlptortopnbble 0x6) then 4. @C descriptor C endif pocfg.mode sequential pocfg.dst j c DCC setup: if B descriptor.if other then 6. dcc_addr B -if there is a register set targezed if (D.R 1) and (Cdescriptor.topnibble 7. @C -descriptor C endif 8. dcc -cfg2.cache -missinst B-descriptor.C dcc cfg2.mode en/de coding else if there is a register set targeted if (D.R 1) and (C -descriptor.toplibble @C -descriptor C end if dcc -cfg2.cache-miss-inst B_descriptor.C endif -Operand Organiser B: -Operand B should be other, anything -wrong, but do it anyway if B-descriptor.if !=other then 9. oobjlen po -len if Bdescriptor.S 0 then oob-dmnr set endif 11. oob said B 12. oob__cfg.operate operate endif at DCC 0x5) then at DCC 0x5) then else is probably a -Operand Organiser C: -Operand C may be a register to set. If it isn't it should -be other, anything else is probably wrong, but do it -anyway if (R.D 0) and (Cdescriptor.if other) then 13. coc-len polen if C-descriptor.S 0 then 14. ooc-dmnr set endif ooc said C 16. ooc_cfg.operate operate endif JPEG Coder: if there is a register set targeted at JC if (D.R 1) and (C -descrptor.topnibble 0x9) then 17. @Cdescriptor C endif 18. jccfg.instruction I.opcode jccfg.decode 1 jc-cfg.operate 1 Result Organiser: if R -descriptor.S 0 then 19. ro-dmnr set 174 endif rosa R if there is a register write targeted at RO if (D.R 1) and (C_descriptor.topnibble 0xB) then 21. @C_descriptor C endif 22. ro_cfg.mode sequential ro_cfg.cut I.C ro_cfg.limit I.T A.6 Transformations and Convolutions Notes 1. Opcode 0x4 (convolutions) and 0x5 (transformations) 2. the coprocessor performs an operation which is a superset of what is required for each of Image Transformations and Convolutions. As far as the coprocessor is concerned the only difference between a ransformation and a convolution is that for a transformation, the kernel step size (horizontally and vertically) is the size of the kernel, whereas for a convolution, the step size is one source pixel.

3. Options are: interpolating or snapping-to-closest pixels pixel accumulation a kernel) or not pre-multiplication or not of the source pixels clamp, wrap or absolute value for determining final result 4. Note that transformations and convolutions don't work in place, i.e. if the source and destination pointers are the same it will break.

Pixel Organiser: Operand A is the kernel descriptor and the PO delivers kernel co-efficients to the DP. This is coded as "other" L 1 long format 0 short format if I.R 0 then 1. polen 0x0000:l.len endif if Adescriptor.S 0 then 2. po_dmr set endif 3. po_said A 4. po_cfg.mode convolution/transformation po_cfg.dst mdp DCC setup: the implied data type here is the source image if B_descrlptor.lf other then dcc_cfg2.cache_miss_inst B_descriptor.C if I.S 0 then dcccfg2.mode<-64 bit mode else dcc_cfg2.mode random mode endif else dcc_cfg2.cache_miss_inst B_descriptor.C endif operand Organiser B: -Operand B is a pointer to source image (other), anything else is probably wrong, but do it anyway if B -descriptor.if !=other then 6. oobjlen polen if B_descriptor.S 0 then 7. oob-dmnr set endif 8. oob said B 9. oob-cfg.operate operate endif -Operand Organiser C: -operand C descriptor is borrowed by the r.c field so 5 OOC is not set up Main Data Path: -kernel descriptor is delivered to MDP via P0 mdplen po -len 11. mdpbm.rows C -descriptaorr mdpbm.cals C_descriptor.c 12. mndpcqfg.instruction I. opcode mdpcfg.longkrnl A -descriptor.L *.mdp_.cfg.decode 1 OV. rmdpcfg.operate 1 Result Organiser: -result will be pixels or part thereof if R-descriptor.S 0 then 13. ro dmnr set endif 14. ro sa R ro-cfg.mode -seouential A.7 Matrix Multiplication Notes Opod 00vndfy 2. Options are: pre-multiplication or not of the source pixels clamp, wrap or absolute value for determining final result Operand C may be a register write -if there is a register set targeted at anything other than -the HOP, PO, RO or DCC if' (D.R 1) and (Cdescriptor.topnibble 0x5,0Ox6, OxA or OxB) then 0. @Cdescriptor C endif -Pixel Organiser: -Operand A is the source pixels. only makes sense to ha=ve -whole pixels, anything else is probably wrong if l.R 0 then 1 paolen OxOOOO:.Ien endif if A-descriptor.S 0 then 2. po_dmr set endif 3. pa said A 0 -if there is a register set targeted at PO if (D.R 1) and (Cdescriptor.topnibble 0x6) then 4. @0 descriptor C endif pocfg.mode sequential pocfg.dst mdz) -DCC setup: -the implied other data type is a matrix of coefficients if B -descriptor.if other then 6. dcc addr B endif if there is a register write targeted at DCC if (D.R 1) and (Cdescriptor.topnibble 0x5) then 7. @0 descriptor C endif if B-descriptor.if other 8. dcc -cfg2.cache-miss-inst B-descriptor.C dcc_cfg2.mode matrix multiply else dcc cfg2.cache miss inst B_descriptor.0 endif operand Organiser B: -Operand B is the matrix co-efficients (other), -anything else is probably wrong, but do it anyway if B-descriptor.if other then 9. oobjlen polen if B_descriptor.S 0 .then oob-dmr set endif :11. oob said B *12. oob-cfg.operate operate endif -Operand Organiser C: -Operand C may be a register to set. If it isn't it should -be other, anything else is probably wrong but do it anyway if (R.D 0) and (Cdescriptor.if other) then 13. aoc_len polen if C_descriptor.S 0 then 14. ooc-dmr set endif ooc said C 16. .occfg.operate operate endif -MDP setup: -if there is a register set targeted at MDP if (D.R 1) and (Cdescriptontopnibble Ox.A) then 17. @0 descriptor C endif 18. mdpcfg~lnstruction I .opcode mdp_cfg.decode 1 mdpcfg.operate 1 -Result Organiser: if R_descriptor.S 0 then 19. ro-dmnr set endif ro-sa R if there is a register write targeted at RO if (D.R 1) and (Cdescriptor.topnibble =OxB) then 21. @0_descriptor C endif 22. ro-cfg.mode sequential A.8 Haiftoning Notes 1. Opcode =0x7 2. Only option is the number of levels of halftonin2 3. can be done on pixels or bytes as long as the halftone screen is appropriately unmeshed or meshed.

Pixel Organiser: -A operand is the source pixels or bytes -0 PO operates in conventional sec-jential mode o* if I.R 0 then 1. po len OxOOOO:Hen endif o if A-descriptor.S 0 then 2. po -dmr set endif 3. pa said A 4. pocfg.mode sequential pocfg.dst mdp -DCC setup: -no implied other data type -if there is a register write targeted at DCC if (D.R 1) and (C~descriptor.tapnibble 0x5) then @0_descriptor C endif if B-descriptor.C 0 then 6. dcc -cfg2.cache_mniss_inst B_descriptor.C endif operand organiser B: -Operand B is the halftone screen, and should be a tile 'anything else is probably wrong. There is no sensible implied "other" data type for halftoning.

if B_descriptodf !=other then 7. ooblen po -len if Bdescriptor.S 0 then 8. oob-dmr set endif 9. oob said B if Bdescriptor.what tile oob-tile C endif 1. oobcfg.operate operate endif operand organiser C: -Operand C word is borrowed- by he tiled Operand B.

-The C -descriptor is ccmpi etell ignored OC is in random mode (defaul-:) and wont be touched -Main Data Path: 12. mdp-bmilevel ILlevels 13. mdpcfg.instruction I opcode mdp__cfg.dlecode I mdpcfg.operate 1 Result Organiser: if R_descriptor.S 0 t-en 14. ro dmr set endif ro-sa R 16. ro-cfg.mode sequential A.9 Memory Copy :Notes I1 Opcode 0x9 2. This instruction uses two quite distinct echarnisms to achieve a memory copy operation: A General Data Transfer uzilises the ncmial L.ta flow path through the coprocessor and so can utilise the various functions asscciated with the data manipulation units in the PO and RO.

A Peripheral DMIA utilises a direct connection between the PIC and the LMC. This means that no data manipulation can be perfconned. and that this operation may be overlappe.d with subsequent instructions.

General Data Transfer -Pixel Organiser: -A operand is the source data -PO operates in conventional sequential mode if L.R 0 then 1. palen OxOOOO:l.Ien endif if A-descriptor.S 0 then 2. pa_dmr B end if 3. po said A 4. pocfg.mode sequenzial pocfg.dst jc -Operand Organiser B: operand B word represents a value to put in po-dmr -Operand Organiser C: -Operand C word represents the value to put in the ro-dmr -JPEG Coder: jccfgInstruction opcode jccfg.ibo D.bo jccfg.obo L~obo jccfg.decode 1.

jccg.operate 1 Result Organiser: if R_descriptor.S 0 then 6. rodrr<- C end 7. ro-sa R 8. ro-cfg.mode sequential A.9.2 Peripheral DMA Notes 'a a I May be overlapped or not. This is dealt with by the IC 2. Operand C may be a re gi ster to set 3. This instruction is different from other "activirv" instructions in that the PIC is the module that drives the data.

-only setup required is for the PIC: if L.S 1 then tfata in from PIC 1. pic_abus_addr R else pic_abus_addr A endif if there is a register write targeted anywhere if D.R 1 then 2. @0 descriptor C endif if I.R 0 then 3. picabuscfg.ab_count OxOO I.Iength endif picabuscfg.abbyteen ILbyte picabuscfg.abtype I.R pic-abus-cfg.start 1 -Pixel Organiser: -Operand A is the source address given to the PIC -The PO is not setup -Operand Organiser B: -OOB is not setup -Operand Organiser C: -OOC is not setup -Result Organiser: -The Result word represents the target address -RO is not set up No~ PhotoCD Decompression This family of instructions consists of three different operations: horizontal interpolation, v'erical interpolation and residual merging. As it happens, the setup for Vertical interpol3.

tion and the setup for residual merging are identical.

Opcode for all these instructions is Wx A-1 0.1 Horizontal Interpolation Notes I.can operate on pixels or bytes 2. this is a one operand instruction so Operand C may be a register to set -if there is a register set tarzeted at anything other than -the MD', P0 or RO if (D.R 1) and (Cdescriptor.toplibble 0x6,OxA or OxB) then 0. @Cdescriptor C endif Pixel Organ iser: if I.R 0 then po len Ox0OOO:I.Ien endif if A-descriptor.S 0 then~ 2. po -dmr set endif 3. po said A -if there is a register set targeted at P0 if (D.R 1) and (Cdecriptor.topnibble 0x6) then 4. @C_descriptor C endif pocfg.mnode sequential po_cfg.dst mdp .0-0 operand organiser B: -Operand B word is completely ignored -The B-descriptor is completely ignored Operand organiser C: -Operand C may be a register to set up -Main Data Path: -if there is a register set targeted at MDP if (D.R 1) and (Cdescriptor.topnibble OXA) then 6. @C_descriptor C endif 7. mdpcfg.instruction I.opcode if A-descriptor.if packed bytes then- tell mdp about size mdp cfg.word input 1 else mdp cfg.word input 0 endif mdpcfg.decode 1 mndpcfg.operate 1 Result Organiser: if Rdescriptor.S 0 then 8. ro-dmnr set end if 9. ro-sa R ro-cfg.mode sequential A.1O0.2 Vertical Interpolation and Residual Merging Notes 1. The setup for Vertical Interpolation and Residual Merging is identical.

2. Can operate on either bytes or pixels 3. This is a tw&o operand instruction so Operand C may be a register set if there is a register set targeted at anything other than the MDP, PO, QOB or RO if (D.R 1) and (C-descriptor.toplibble 0x6,0x7,OxA or OxE) then 0. @Cjdescriptor C endif Pixel Organiser: if I.R 0 then 1. po_len OxOOOO:I~en endif if' Adescriptor.S 0 then poa-dmr set endif 3. po said A -if there is a register set targeted at P0 if (D.R 1) and (Cdescriptor.toplibble 0x6) then 4. @Cdescriptor C endif po_cfg.maode sequential po-cfg.dst mdp DCC setup: -no implied other data type -if there is a register write targeted at DCC 6. if (D.R 1) and (C-descriptor.toplibble 0x5) then endif if B-descriptor.C 0 then dcc -cfg2.cache_mnissinst B-descriptor.C endif operand organiser B: operand B is the residuals or one operand for -interpolation, anything else is probably wrong, but -do it anyway -There is no sensible implied "other" data type for this.

if B-descriptor.it other then 7. oob-len pojen if B_descriptor.S =0 then 8. aeb-dmnr set endif 9. oob-said B endif -if there is a register set tarceted at QOB if (D.R 1) and (Cdescriptor.topnibble 0x6) then @0_descriptor C endif oobcfg.operate operate endif -Operand Organiser C: -may be a register to set -Main Data Path: -if there is a register set tarceted at MDP if (D.R 1) and (Cdescriptor.toplibble =OxA) then 12. @0_descriptor C endif 13. mdpcfg.instruction I.opcode if A -descriptor.if packed-bytes tell mdp about size mdp cfg.word input 1 else mdp cfg.word input 0 endif mndpcfg.decode 1 mdp-cfg.operate 1 .8 0 0**e 0 0000 9 *0*9 0 *9 0e 0* *0*4 0 *000 Result Organiser: if R_descriptor.S 0 then 14. ro dmr set endif ro-sa R 16. ro-cfg.mode 0 ceauential A.1 1 Control Instructions Notes 1. Control Instructions consist of two classes of operations: Flow Control Instructions and Internal Access Instructions.

A.1 1.1 Flow Control Notes 1 Opcode OxB 2. Flow Control Instructions currently consist of Jumps of various kinds and Waits of various kinds.

3. No explicit setup is done in the coprocessor, and this instruction is not an "activity" instruction, ie no the coprocessor submodules other than the instruction controller actually do anything.

4. Operand C may be a register to Set.

only thing to do is: if D.R 1 then 0. @Cdescriptor C endif Pixel Organiser: no setup associated with Operand A Operand Organiser B: no setup associated with Operand Organiser C: no setup associated with Result Organiser: no setup associated with Operand B Operand C the Result A.11.2 Internal Access: Read Notes 1. Opcode =OxA 2. A "read" is a transfer of data out of the coprocessor 3. The only module in the coprocessor that actually does anything for this is the RO 0@OS 4 S

OB

S

S.

SO

0 Pixel Organiser: no setup associated with Operand Organiser B: no setup associated with Operand Organiser C: no setup associated with Result Organiser ro_subst Cbus(A) ro_sa B ro_cfg.mode Cbus_data Operand A Operand B Operand C S S

C

S S A.11.3 Internal Access: Write Notes 1. Opcode =OxA 2. A "write" is a transfer of data into the coprocessor.

3. This instruction is not an "activity" instruction as no modules other than the IC actually do anything.

1. Cbus(A) B Pixel Organiser: no setup associated with Operand Organiser B: no setup associated with Operand Organiser C: no setup associated with Result Organiser: no setup associated with Operand A Operand B Operand C the Result A-12 Reserved Instructions Notes Opcodes OxO, OxE and OxF are -reserved".

2. A "reserved- instruction will generate a (rnaskable) error.

3. These "reserved" opcodes are intended to be used for other instructions that may be added in later revisions of the coprocessor.

185 Appendx B: Registers 1.1 Registers and Tables This Section describes the coprocessor's registers. The2se registcrs can be modified in one of three ways: 1. Specific the coprocessor instructions exist for reading and writing registers. By using these instructions these registers can be read or written using initiator PCIbus cycles, or by transactions on the Generic Interface, or to/from any memory that may be connected to the Local Memory Interface.

2. Many registers change value as a side effect of instruction execution. The primary mechanism by which the coprocessor configures itself for instruction execution is by setting various registers to reflect the currently executing instruction. At the end of the instruction, the registers reflect the state of the coprocessor at that time.

Most typical operations can be completely specified and set up by the one instruction. In some cases, it is necessary to set some registers immediately prior to executing the instruction.

Semantics of "reserved" register bits Any registers or parts thereof that are "reserved" have the following semantics: a write to a reserved location will succeed and the data will be discarded a read from a reserved location will succeed and will result in undefined value °All unspecified registers and register fields are reserved.

1.1.1 Register Taxonomy The registers in the coprocessor are classified into types based on their behavior as described in this section. In these descriptions: Sexternally external to the module, i.e. via the Cb-s interface, i.e. via target mode PCI, by the Instruction controller or via the external Cbus interface. Note that the registers can't :be set via bit-set (Type C) mode from the PCIbus.

internally internally to the module Status Register A status register is read-only externally and read/write internally.

Configl Register A Configl register is read'write externally and read only internally.

A Configl register does not support Type C Cbus operations (ie does not support bit set mode) and is used for registers that hold byte (or bigger) type configuration information such as address values.

Config2 Register A Config2 register is also read/write externally and read only internally.

A Config2 register supports Type C Cbus operations (ie supports bit set mode) and is used for registers that hold configuration information that may need to be set on a bit by bit basis.

Controll Register A Control I register is readable/writable both internally and externally.

A Controll register does not support Type C Cbus operations (ie does not support bit set mode) and is used for registers that hold byte (or bigger) type control information such as address values.

Control2 Register A Control2 register is readable/writable both internally and externally.

A Control2 register supports Type C Cbus operations (ie supports bit set mode) and is used for registers that hold control information that may need to be set on a bit by bit basis.

Interrupt Register The bits within an Interrupt register are settable to 1 intemally and resettable to 0 externally by writing a 1 to that bit.

Each of the module interrupt/error registers are of this type. Each module's interrupt/error register consuists of three fields: represents any error conditions generated by the module [23:8] represents any exception conditions generated by the module [31:24] represents any interrupt conditions generated by the module.

1.1.2 Register Map Table 1.1 shows the coprocessor's registers. The "number" in Table 1.1 is the number of the register rather than a byte address.

Table 1.1 the coprocessor registers number ame decrito see pag External Interface Controller Registers page 26 0x00 eic_cfg Config2 Configuration 0x01 eic_stat Status Status 0x02 eic_errint Interrupt Error and Interrupt Status 0x03 eic err_int en Config2 Error and Interrupt Enable 0x04 eictest Config2 Test modes 0x05 eic.gen_pob Config2 Generic bus programmable output bits.

0x06 eic_high_addr Configl Dual address cycle offset 0x07 0x08 eic_wtlb_v Control2 Virtual address and operation bits for TLB Invalidate/Write 0x09 eic_wtlb_p Config2 Physical address and control bits for TLB S Write OxOA eic_mmu_v Status Most recent MMU virtual address translated, and current LRU location.

OxOB eic_mmup Status Most recent page table physical address fetched by MMU.

OxOC eic_ip_addr Status Physical address for most recent IBus access to the PCI Bus.

OxOD eic_rp_addr Status Physical address for most recent RBus access to the PCI Bus.

Table 1.1 the coprocessor registers a a ubr namre-*- tye.esr.t:nsee pag OxOE eic_10_addr Status Address for most recent IBus access to the Generic Bus.

OxOF eic-ray data Status Address for most recent RBus access to the Generic Bus.

Local Memory Controller Registers page 32 Ox1Q Imi cfo, Control2 General config-uration regyister Oxi I Imi-sts Status General status register Ox 12 Imi-err-imt Interrupt Error and interrupt status register 0x13 Imi-err-int-en Control2 Error and interrupt enable register 0x14 Imri-dcfo, Control 2 DRAM configuration register______ Ox 15 Imi-mode Contro12 SDRAM mode register Ox 16 Ox 17 Ox 18 Ox 19 OxIA Ox lB OxI1D Ox IE Cxl F _________Peripheral Interface Controller Registers page 36 0x20 Pic cfa Config,2 Configuration______ 0x21 pic stat Status Status 0x22 pic-err-imt Interrupt Interrupt/Error Status 0x23 pic-err.-mt en Config,2 Interrupt/Error Enable 0x24 pic...abus_fg Control-2 Configuration and control for ABus 0x25 pic-abus addr Configa 1. the coprocessort address for ABus transfer 0x26 pic-cent-cfa Contro12 Configuration and control for Centronics mode.

0x27 pic-cent dir Conficg2 Centoonics pin direct control register 0x28 pic-re-verse-cfg Contro12 Configuration and control for reverse (input) d ata transfe rs 0x29 Ox2A pic-timetO Config I Initial data timer value.

Ox2B pic-timeri Confi g I Subsequent data timer value.

Ox2C Ox2D Ox2E Ox2F Miscellaneous Module Registers page 8 0x30 mmcfo oifg Configuration Register Table 1.1 the coprocessor registers numnber: nam. type description 0031 nu-star Status Status Register 0032 ni e rr it Interrupt Error and Interrupt Rerster 0033 mm-err mnt_en Config2 Error and Interrupt Masks 0034 MM crcfa Config,2 Global Configuration Rer2ister 0035 mm -diacy Config, Diagnostic Configuradtiz- Register 0036 nmmgrst Config* Global Reset Register 0037 nmaerr Config2 Global Error Register 0x8 m.gexp ConfigY2 Global Exception Regiq:er 0039 nun cint Config,2 Global Interrupt Regris:er, Ox3A mm active status Global Active signals 003B Ox3C O01) Wx3E Ox3F Instruction Controller Registers page 0x40 ic cfg Cfg Cofiuation Registe7 0x41 ic-stat Status/ Status Register 0x42 ic err int Interrupt Error and Interrupt Re:'ster (write to clear error and interrupt) 0x43 ic err int-en Config2 Error and Interrupt Enabl-e Regrister Ox44 ic-ipa Control 1 A stream Instruction P,,nter 0x45 ic_tda Configai A stream Todo Registe.

0x46 ic-fna Control 1 A stream Finished Resister 0x47 ic inta Configi A stream Interrupt Register 0x48 icjoa Status A stream Last Overlapped Instruction number 0x49 ic-ipb Control 1 B stream Instruction Pointer Ox4A ic tdb ConfigcyI B stream Todo Register Ox4B ic-fnb Control 1 B stream Finished Rebster Ox4C 1c intb Config I B stream Interrupt Register______ Ox4D ic-lob Status B stream Last Overlapped Instruction Sequence number Ox4E ic-sema Status A stream Semaphore Ox4F ic-semb Status B stream Semaphore Data Cache Controller Registers page 42 0x50 dcc..cfgI conficg2 DCC configuration I reister 0x51I dcc-stat status state machine status bits 0x52 dcc-erTrint status DCC error status register 0053 dcc-err-int-en control I DCC error interrupt erable bits 0x54 dccscfg2 contro12 DCC configuration 2 register Table 1.1 the coprocessor registers numnber na7 decSto name type srti6ee ,page 0x55 dcc-addr confi 2 Base address register -'Dr special address modes.

dc Iv cotral valid" bit status for 0 to 31 0x57 dcc-lvi controllI "valid" bit status for ';:nes 32 to 63 0058 dcc_1v2 controllI "valid" bit status for 11:2es 64 to 0x59 dcc-lv3 controllI "valid" bit status for 96 to 127 dcc-raddrb status Operand Organiser B tquest address dcc-raddrc: Status Operand Organiser C -tquest address WxC dcc-test control I DCC test register WxE Organiser Registers page 0x60 pa -cfg Confi g2 Conf i turation Re(,is[,e 0x61 po--stat Status Status Regiister 0x62 pa_err-int Interrupt Error/Interr-upt Status Register 0x63 p~err nc en Config2 Error/Interrupt Enable Rgse 0x64 pa dm- Config2 Data- Manipul adion Re-,:ister 0x65 pa subst Confi a2 Substitution Value Re-7ister 0x66 pocdp Status Current Data Pointer 05x67 pa len Control Length Register 0x68 pa_said Control I the coprocessort Adci-ess or Imtmediate Data 06x69 pa idr Control2 Image Dimensions R-ister Ox6A poa muv valid Control2 MUTV valid bits 6x6B pa mruv' Confi s!I Base address of MLJY* RAM Ox6C! Ox6D) Ox6E Ox6F Operand Organiser B Registers page 46 0x70 oob cfa, Config2 Configuration Register 0x7 1 oob stat Status Status Register 0x72 aob-err-imt Interrupt Error/Interrupt Register 0x73 oab, err int en Config2 Error/Interrupt Enable Register 0x74 oob drnr Config2 Data Manipulation Register 0075 oob subst Confi-2 Substitution Value Re-ister 0076 oob-cdp Status Current Data Pointer 0077 oobjlen Control I Input ength Register 0078 aab-said Contraol I Operand the coprocessort Address 0079 oob_ile Control I Tiling lengh/offset Reister Ox0A 1 .1 Table 1.1 the coprocessor registers numbe nam j tpe Idescription 4 seepae1 Ox 7B Ox 7C Ox7D WxE Ox7F OperandOrganiser C Registers page 46 0x80 oxc-cfc Config2 Configuration Resist.er 0x81 ooc stat Status Status Regyister 0x82 ooc err imt Interrupt Error/Interrupt Register 0x83 ooc err int en Config2 Error/Interrupt Enable Register 0x84 ooc-dmr Config2 Data Maniipulation Resister 0x85 ooc-subst Config2 Substitution Value Register 0x86 ooc-cdp Status Current Data Pointer 0x87 ooc-len ControllI Input Length Register 0x88 ooc-said Control I Operand the coprocessonE Address 0X89 ooc tile Control I Tiling, length/ofiset Resister Ox8A Ox8B WxC OxWD WxE Ox8F JPEG Coder Registers page 63 0X90 jcscfg Config2 configuration______ 0X91 jc-stat Status status 0x92 jc...err it. Interrupt error and interrupt status register 0x93 jc..err~nt-en Config2 error and interrupt enable register 0x94 jc-rsi ConfigI rethe coprocessort interval 0x95 jc...decode Contro12 decode of current instruction 0x96 jc...res Control 1 residual value 0x97 jc-table-sel Control2 table selection from decoded instruction 0x98 0x99 WxA Ox9B Ox9C WxD WxE Ox9F OxO mpcgMain Data Path Registers page 54 OxO mdcgConfig2 Iconfiguration Table 1.1 the coprocessor registers 4 4* a. a 4* a number*' am descriptionsepg OxAl mdp-sta3t Status status OxA2 mdperri nt Interrupt error/interrupt OxA3 mdp-err-inren Config2 error/interrupt enable OxA4 mdp-test Config2 test modes mdp-oplI Control2 current operation I OxA6 mdp op2 Control2 current operation 2 OxA7 mdp-por Control 1 offset for plus operate: OxA8 mdp-bi Control I blend the coprocessor offset to index table entry OxA9 mdp-bm Control 1 blend end or number of rows and columns in matrix, binary places, and number of levels in haiftoning OxAA mdp-jen Control I Length of blend to proiuce OxAB OxAC OxAD OxA.E OxAF Result Organiser Registers page 68 OxBO ro-cfg Confia2 Configuration Registe:7 OxB I rO stat Status Status Register OxB2 ro err imt Interrupt Error/Interrupt Regis',er OxB3 ro err-int-en Config2 Error/Interrupt Enable Register OxB4 ro drr Config2 Data Manipulation Register OxB5 ro-subst Configi- Substitution Value Register OxB6 ro-Cdp Status Current Data Pointer OxB7 ro len Status Output Length Register OxB8 ro-sa Configi the coprocessort Address OxB9 ro-idr Configi, Image Dimensions Register-______ OxBA OxBB ro_vbase Config-I the coprocessor Virtual, Base Address OxBC ro cut Confi-I Output Cut Register OxBD ro int Configi Output Length Limit OxBE OxB F PCIbus Con figuration Space alias NxCO- A read only copy of PCI configuration space page 73 OxCD, regyisters OxO to OxD zand OxF.

OxCF OxCE pci-external-cfg Status 32-bit field downloaded at reset from an external serial ROM. Has no influence on the _________coprocessor's operaion.

1192 Table 1.1 the coprocessor registers number name ye descriptionseae Input Interface Switch Registers page 23 OxDO uis-cfo Cpnfig2 Conf-iguration Register OxDl uis stat Status Status Register OxD2 iis-err-iu Interrupt Inten-upt/Error Status Register OxD3 uis-err iuen Config2 Intierrupt/Error Enable Register OxD4 uis-ic-addr Status Input address from IC uis-dcc-addr Status Input address from DCC OxD6 iis-po.addr Status Input address from P0 OxD7 uis-burst Status Burst Length from P0, DCC IC OxD8 uis-base-addr Configi Base address of the coprocessor memory object in host memory map OxID9 iis test Configi Test mode register OxDA OxDB OxDC OxDD OxDE OxDF OXEO- not used OxFF 1.1.3 Register Definitions Miscellaneous Module Registers a. mm-cfg Table 1.2 mmcf g Register Fields Field E =bypassbed b. mm-stat Table 1.3 mm-stat Register Fields Field 'Nam we:pt Reserved c. mm-err-int Table 1.4 mm-err-int Register Fields Reserved d. mm-err-int-en 0@ Table 1.5 mm-err-imt-en Register Fields Reserved *see 0#06 *.9 0906 S.0 04.0 e. mmgcfg Table 1.6 mmgcfg Register Fields Field Name (ea.ol).aleofth.. epcc iga s i to. eneate..

e k t o.en e .t e 1 Fd .lw~i (ra ony divid sorc clock.. byX 2" tori n.:er:rae 2usconfig (read only)vauoftesenl 0 =d gneriid bus cofgue I= external cbus configured 31:1 Reserved f. mm-diag Table 1.7 mm-diag Register Fields fee* so 0 0 9 to*& 00 Ur~ .tee 00 .900 feet :Fiel Name Decription diag icf-[l:0] program w~hich diagnotc pero h igipn 00= the coprocessor busy 01 =new A stream instruction strobe B stream instruction strobe I I=new either stream instruction strobe 3:2 diacdcf-[l:0] program which dia.0nostics appar on the d i ag_d pi rs: 00=acivity diagnostics: diag-d[Ol PCIbus master transaction diag d generic bus transaction diag_d 2 2 local memory transaction diag-d 3 3 periph,-ral interface transaction diag_d 4 non ov~erlapped instruction active diag_d 5 overlapped instruction active 0 1=instruction diacynostics: diag-d 0 =current instruction opcode diag_d 4 curreni instruction stream diag-d[ 51 unused nc diamotis diag_d (O i data cache hit diag_d 1 servicina data cache miss diag_d 2 TB N I diag_d 3 servicing TLB miss diag_d [4 MUV Nti diag-d 51 servicinla MUV miss I I=stall diagnostics: diag_d 0] waiting on output from PO diag-d 11 waiting on output from OOB diag_d waidn2g on output from OOC diag_d 3 stall due to RO fifo full diag_d i 4 waiting on instruction fetch unused g. rmmgrst Table 1.8 mmgqrst Register Fields Fieldp[O nam Descrptio 15:0 msrst[ 15:01 Per-module softwz--e resets.

Write I to approp22ate bit to cause software reset. These bits are self clearin2.

bit 0 External 1:-:e-rface Controller bit I Local Me7-z:ry Controller bit 2 Peripheral Interface Controller bit 3 Miscellanezu ,s Module bit 4 Instruction Controller bit 5 Data Cache Controller bit 6 Pixel Organi-ser bit 7 Operand O:zaniser B bit 8 Operand O.:zaniser C bit 9 JPEG Coc: bit 10 Main Path bit I I Result O:--aniser bit 12 reserved bit 13 Input Inie'ace Switch bit 14 reserved bit 15 Software Reset all modules h. mmgerr Table 1.9 mmgerr Register Fields

D

Field Name- Description: 31:16 err[15:0) Per-module error status bits: Note that these bits are read only. To clear the error condition, the appropriate module error bit should be cleared.

0 no error condition from this module 1 error condition from this module bit 0 External Interface Controller bit 1 Local Memory Controller bit 2 Peripheral Interface Controller bit 3 Miscellaneous Module bit 4 Instruction Controller bit 5 Data Cache Controller bit 6 Pixel Organiser bit 7 Operand Organiser B bit 8 Operand Organiser C bit 9 JPEG Coder bit 10 Main Data Path bit 11 Result Organiser bit 12 reserved bit 13 Input Interface Switch bit 14 reserved bit 15 error on any module 15:10 err_en[15:0] Per-module error enables: 0 error conditions from this module are not translated into an interrupt of the host 1 error conditions from this module are translated into an interrupt of the host bit 0 External Interface Controller bit 1 Local Memory Controller bit 2 Peripheral Interface Controller bit 3 Miscellaneous Module bit 4 Instruction Controller bit 5 Data Cache Controller bit 6 Pixel Organiser bit 7 Operand Organiser B bit 8 Operand Organiser C bit 9 JPEG Coder bit 10 Main Data Path bit 11 Result Organiser bit 12 reserved bit 13 Input Interface Switch bit 14 reserved bit 15 interrupt on any module i. mm_gexp Table 1.10 mm_gexp Register Fields Field ij Name Description...

31:16 exp[15:0] Per-module excep:;n status bits: Note that these bits are read only. To clear the exception condition, the appropriate module exception bit should be cleared.

0 no exception ccr.dition from this module 1 exception conc::ion from this module bit 0 External In:sface Controller bit 1 Local Memnry Controller bit 2 Peripheral I.-erface Controller bit 3 Miscellaneous Module bit 4 Instruction Controller bit 5 Data Cache Controller bit 6 Pixel Orgar-ser bit 7 Operand Organiser B bit 8 Operand Organiser C bit 9 JPEG Code: bit 10 Main Data Path bit 11 Result OrgEniser bit 12 reserved bit 13 Input Interfae Switch bit 14 reserved bit 15 exception cn any module 15:0 exp_en[15:0] Per-module exception enables: 0 exception cond:ions from this module are not translated into an interrupt of host 1 exception conditions from this module are translated into an interrupt of the host bit 0 External Interface Controller bit 1 Local Memory Controller bit 2 Peripheral Interface Controller bit 3 Miscellaneous Module bit 4 Instruction Controller bit 5 Data Cache Controller bit 6 Pixel Organiser bit 7 Operand Organiser B bit 8 Operand Organiser C bit 9 JPEG Code: bit 10 Main Data Path bit 11 Result Oraniser bit 12 reserved bit 13 Input Inteface Switch bit 14 reserved bit 15 exception on any module j. mmgint Table 1.11 mmgint Register Fields

S

S

Field :Name Description 31:16 int[15:0] Per-module interrupt status bits: Note that these bits are read only. To clear the interrupt condition, the appropriate module interrupt bit should be cleared.

0 no interrupt condition from this module 1 interrupt condition from this module bit 0 External Interface Controller 'bit 1 Local Memory Controller bit 2 Peripheral Interface Controller bit 3 Miscellaneous Module bit 4 Instruction Controller bit 5 Data Cache Controller bit 6 Pixel Organiser bit 7 Operand Organiser B bit 8 Operand Organiser C bit 9 JPEG Coder bit 10 Main Data Path bit 11 Result Organiser bit 12 reserved bit 13 Input Interface Switch bit 14 reserved bit 15 interrupt on any module 15:0 inten[15:0] Per-module interrupt enables: 0 interrupt conditions from this module are not translated into an interrupt of the host 1 interrupt conditions from this module are translated into an interrupt of the host bit 0 External Interface Controller bit 1 Local Memory Controller bit 2 Peripheral Interface Controller bit 3 Miscellaneous Module bit 4 Instruction Controller bit 5 Data Cache Controller bit 6 Pixel Organiser bit 7 Operand Organiser B bit 8 Operand Organiser C bit 9 JPEG Coder bit 10 Main Data Path bit 11 Result Organiser bit 12 reserved bit 13 Input Interface Switch bit 14 reserved bit 15 interrupt on any module k. mm_active Table 1.12 mmactive Register Fields Sield Name; Description 15:0 macdvc[15:0] Per-module active signals (Read Only): These bits unlatched bit 0 External Interface Controller bit 1 Local Memory Controller bit 2 Peripheral Interface Controller bit 3 Miscellaneous Module bit 4 Instruction Controller bit 5 Data Cache Controller bit 6 Pixel Organiser bit 7 Operand Organiser B bit 8 Operand Organiser C bit 9= JPEG Coder bit 10 Main Data Path bit 11 Result Organiser bit 12 reserved bit 13 Input Interface Switch bit 14 reserved bit 15 any module active 31:16 Reserved Instruction Controller Registers I. ic_cfg The ic_cfg register is divided into three pans. The least significant byte contains global configuration information. The third least significant byte contains A stream configuration information and the most significant byte contains the B stream configuration information.

This register has a reset value of Ox00000000.

Table 1.13 ic_cfg Register Fields 1 E l=enabled 0-disabled 2 B 0=not bypassed 1 =bypassed 3 S 0=not in self test mode l=self test mode pri[1:0] instruction stream priority: 0=A high, B low l=B high, A low 2=3=round robin zoo Table 1.13 ic_cfg Register Fields o o* ft Field Namrne Description 6 asr Asynchronous s:all reject: 0=not enabled l=enabled 7 pd Partial Decode enable: 0=not enabled 1=enabled 8 cbus eic dis Disable requests from the EIC for Cbus cycles O=do not disable 1 =di sable 9 cbus_mm_dis Disable requests from the MM for Cbus cycles 0=do not disable 1=disable cbus int dis Disable requests from the IC for Cbus cycles 0=do not disable 1 =disable 16 a_en 0=A stream disabled I =A stream enabled 17 a_seq 0=A stream sequence numbers disabled I=A stream sequence numbers enabled 18 a_prefetch O=A stream prefetching disabled S=A stream prefetching enabled 19 a_overlap_en 0=A stream overlapping disabled I= A stream overlapping enabled 20 a_sncpause 0 A stream do not pause on "sequence number completed" interrupi 1 A stream pause on "sequence number completed" interrupt 21 a_icpause 0 A stream do not pause on "instruction completed" interrupt 1 A stream pause on "instruction completed" interrupt 22 a_auto_prime 0=A stream "sequence number completed" interrupt not automatically primed I =A stream "sequence number completed" interrupt automatically primed 24 ben 0=B stream disabled l=B stream enabled b_seq 0=B stream sequence numbers disabled S=B stream sequence numbers enabled 26 b_prefetch 0=B stream prefetching disabled S=B stream prefetching enabled 27 b_overlapen 0=B stream overlapping disabled I=B stream overlapping enabled PoLl Table 1.13 ic_cfg Register Fields o Field Name Description 28 b_snc_pause 0 B stream do not pause on "sequence number completed" interrupt 1 B stream pause on "sequence number completed" interrupt 29 b_ic_pause 0 B stream do not pause on "instruction completed" interrupt 1 B stream pause on "instruction completed" interrupt b_auto_prime O=B stream "sequence number completed" interrupt not automatically primed 1 =B stream "sequence number completed" interrupt automatically primed m. icstat This register is split into four sections. The least significant byte contains the internal state of the IC. The second least significant byte contains the decoded result of the current instruction, and current and prefetched instruction stream. The second most significant byte contains all status information about the A stream, and the most significant byte contains information about the B stream.

The reset value of this register in Ox00000000.

Table 1.14 ic_stat Register Fields ec_state[3:0] instruction execution state condition.

0 idle 1 fetching instruction 2= waiting for overlapped instruction to finish 3= decoding 4= prefetching instruction 5= wait for instruction to finish 6= synchronise with external accesses prior to updating registers 7= update state registers 8= bad state 8 overlap 0 overlapped instruction not in progress 1 overlapped instruction in progress 9 ic nterrupt 0 will not interrupt when completed 1 will interrupt when completed jump 0 current instruction is not a jump instruction 1 current instruction is a jump instruction 11 prefetched 0 the next instruction is not prefetched into the prefetch buffer 1 the next instruction is prefetched into the prefetch buffer a ,0oL Table 1.14 ic_stat Register Fields Field Name Description: 12 stream currently execuing (non-overlapped instruction) stream: 0 stream A 1 stream B 13 pref_stream stream of instruction prefetched: 0 stream A 1 stream B 14 condition 0 jump condition not met 1 jump met 16 a_wait 0 A stream is running normally 1 A stream paused because semaphore is taken 17 a_async 0 No asynchronous transfer in progress in stream A 1 Asynchronous transfer in progress in stream A 18 a_busy 0 A stream not busy 1 A stream busy 19 a_sem A stream register semaphore status: 0 semaphore not claimed by anyone or claimed by hardware 1 semaphore held externally The agent recieving the semaphore will see a in this bit.

a lock 0 A stream not locked in 1 A stream locked in 21 a_primed 0 A stream "sequence number completed" interrupt not primed 1 A stream "sequence number completed" interrupt primed 22 a_paused A stream pause 0 A stream is not paused due to interrupt or error 1 A stream is paused due to interrupt or error rethe coprocessort execution by writing I 23 aolprimed 0 A stream "overlapped instruction sequence number completed" interrupt not primed 1 A stream "overlapped instruction sequence number completed" interrupt primed 24 bwait 0 B stream is running normally 1 B stream paused because semaphore is taken b_async 0 No asynchronous transfer in progress in stream B 1 Asynchronous transfer in progress in stream B 26 b_busy 0 B stream not busy 1 B stream busy Table 1.14 ic_stat Register Fields ield e cription:: 27 b_sem B stream register semaphore status: 0 semaphore not claimed by anyone or held by the coprocessor 1 semaphore held externally The agent recieving the semaphore will see a in this bit.

28 b lock 0 B stream not locked in 1 B stream locked in 29 b_primed 0 B stream "sequence number completed" interrupt not primed 1 B stream "sequence number completed" interrupt primed b_paused B stream pause 0 B stream is not paused due to interrupt or error 1 B stream is paused due to interrupt or error rethe coprocessort execution by writing 1 31 bolprimed 0 B stream"overlapped instruction sequence number completed" interrupt not primed 1 B stream "overlapped instruction sequence number completed" interrupt primed n. ic err int This register contains active high flags indicating whether an error or interrupt has occurred within the IC. Each bit can be cleared by writing a The reset value of this register is 0x0000000O.

Table 1.15 icerr int Register Fields i ld 8 aillerr A stream iegal instruction error 18 aillerr A stream illegal instruction error 16 b illerr. B stream illegal instruction error 24 asncint A stream "sequence number completed" interrupt 25 aicint A stream "instruction completed" interrupt 26 asnsint A stream "sequence number the coprocessorted" interrupt 27 a is int A stream "instruction the coprocessorted" interrupt 28 b_snc_int B stream "sequence number completed" interrupt 29 b icint B stream "instruction completed" interrupt b sns int B stream sequence number the coprocessorted" interrupt 31 b is int B stream instruction the coprocessoned" interrupt 2 0L.

o. icerrinten This register contains the masks used to enable various errors or interrupts and has a reset value of 0x00000000.

Table 1.16 icerr int en Register Fields SFie.ld Name Des cription 8 a_illerr_en A stream illegal instruction error enable 16 b illerren B stream illegal instruction error enable 24 a snc int en A stream "sequence number completed" interrupt enable a ic int en A stream "instruction completed" interrupt enable 26 a_snsint A stream "seque.ce number the coprocessoned" interrupt enable 27 a is int A stream "instruction the coprocessoned" interrupt enable 28 bsncint B stream "sequence number completed" interrupt enable 29 b ic int B stream "instruction completed" interrupt enable bsns int B stream sequence number the coprocessorted" interrupt enable 31 b is int B stream instructon the coprocessoned" interrupt enable p. icipa This register holds the most significant 30 bits of next vinual address to be used to fetch an instruction for the A stream. The least two simnificant bits are assumed to be zero as instructions must be word aligned.

The reset value of this register is 0x00000000 Table 1.17 ic_ipa Register Fields Field Name Description [31:0] ipa[31:2] A stream instruction pointer q. ic_tda This register holds the "to do" value for the A stream. This is a 32 bit (wrapping) sequence number up to which valid instructions exist.

S The reset value of this register is 0x0000000 Table 1.18 ic_tda Register Fields Field Name Description [31:0] tda[31:0] A stream "to do" value r. ic_fna This register holds the "finished" value for the A stream. This is a 32 bit (wrapping) sequence number indicating the last completed instruction.

The reset value of this register is OxOOOOOO().

Table 1.19 icfna Register Fields Field j. name J.

[31:0] fna[31 A stream "finis Description hed" value s. ic inta This register holds the "interrupt" sequence number for the A stream. This is a 32 bit (wrapping) sequence number at which to "interrupt at" if the mechanism is enabled and primed.

The reset value of this register is OxOOOOOOOO Table 1.20 icinta Register Fields [31:0] inta[31 A stream 'interrpt" value t. ic lba Ths register holds the 32 bit (wrapping) sequence number of the last overlapped instruction to e executed on the A stream.

The reset value of this register as OxOO(X)0000 Table 1.21 ic_ba Register fields 4 4* u. icjipb This register holds the most significant 30 bits of the next virtual address to be used to fetch an instruction for the B stream. The least two significant bits are assumed to be zero as instructions must be word aligned.

The reset value of this register is OxOOOOOOOO Table 1.22 icipb Register Fields Field fla m e [)eicr ptior i

I

131:01 ipb[31:2] B stream instruction pointer v. ic_1db This register holds the "to do" value for the B stream. This is a 32 bit (wrapping) sequence number up to which valid instructions exist.

The reset value of this register is OxOOOOOOOO Table 1.23 ictdb Register Fields Fiel Name. deW:riptio [31:0] tdb[31:0] B stream "to do" value w. icfnb This register holds the "finished" value for the B stream. This is a 32 bit (wrapping) sequence number indicating the last completed instr:;;ion.

The reset value of this register is Ox000000.

Table 1.24 icfnb Register Fields :Field Name Description [31:0] fnb[31:0] B stream "finished" value x. ic_intb This register holds the "interrupt" sequence number for the B stream. This is a 32 bit (wrapping) sequence number at which to "interrupt at" if the mechanism is enabled and primed.

The reset value of this register is 0x00000000 Table 1.25 icintb Register Fields Field Name Descr [31:0] intb[31:0] B stream "inter-upt" value iption 4 y. iclob This register holds the 32 bit (wrapping) sequence r.--nber of the last overlapped instruction to be executed on the B stream.

The reset value of this register is Ox00000000 Table 1.26 ic_lob Register fields This register is an alias for the ic_stat register with the side effect that a read of this register is a request for the A stream register semaphore.

aa. ic_semb This register is an alias for the ic_stat register with the side effect that a read of this register is a request for the B stream register semaphore.

4 444.

2'07 Input Interface Switch Registers ab. iis-cfg Table 1.27 iis-cfg Register Fields Table 1.28 Field(bs U Definition [31:14] Reserved [13:12] po-p priority of P0 (0 lowest, 2 hihest) [11:10] dcc..p priority of DCC (0 lowest, 2 highest) i cp priority of IC (0 lowest, 2 W highest) Reserved S 0 not in self test mode I= self test mode B 0 =not bypassed bypassed E1 0 0=disabled I= enabled ac. iis-stat uis stat Register Fields (31:25] Reserved [24] i..prefetch-po state of i-pref etch-po signal [23] L-prefetch-dcc state Of i iDre fetch dcc signal [22] i-prefetch ic state of i tref etch ic signal [21:20] lmc-pojpri rotating priority of POarbitrating for the LMC [19:18] lmc dcc Ipri rotating priority of DCC arbitrating for the LMC [17:16] lmc icIpri rotating priority of IC arbitrating for the LMC [15:14] eic..pqojpri rotating priority of POarbitrating for the ETC [13:12] eic_dcc_-Ipri rotating priority of DCC arbitrating for the ETC_ [11:10] eicjicpri rotating priority of IC arbitrating for the ETC 9 Icgnpo I PO is granted control of LMC 8 lm dcc 1 DCC is granted control of LMVC 7 lmcgnt ic I IC is granted control of LMC 6 eic-gnt-po 1 PO is granted control of ETC eic-gnt-dcc I DCC is granted control of EIC 4 eic-gnt-ic I IC is granted control of ETC 3 valid -reqpo 1 legal request made to IIS by P0 2 ~validjreq dcc 1 eglrquest made to IIS by DCC S.

C.

C

CRC.

C S CC C

*CC.

C

.RC.

Table 1.28 uis-stat Register Fields Table 1.29 see* 4 so a 06So

S.

Field (bits)NaeDintn valid-req-ic I legal nr.uest made to IIS by IC 0 i~source stt -o source si~naI ad. uis err mnt uis-err_int Register Fields ::Field~bt)I Nm:~.Dfnto [31:16] interrupt interrupt czondition [15:0] error error con ft;ion bit 3 IB.s request made to 115 while disabled bit 2 rezZ' request from illegal the coprocessor location from Pixe:. Orrnser bit 1 rea:- request from illegal the coprocessor location from Datas Cache Controller bit 0 rea. request from illegal the coprocessor location f- zrn Instruction Controller ae. uis-err-imt-en uis-err-imt-en Register F ields Field(b 1)s a i nition [31:16] mnt-mask interrupt m~'ask [15:0] err-mask error mask bit 3 IBus request made to 115 while disabled bit 2 reai request from illegal the coprocessor location from Pixel Organiser bit 1 reai request from illegal the coprocessor location from Data Cache Controller bit 0 =reaiJ request from illegal the coprocessor location from Instn,,ction Controller Table 1.30 5* 0 S 55

S.

0605 S 5 af. iis ic-addr Table 1.31 uisic-addr Register Fields Table 1.32 Table 1.33 Table 1.34 .:Field(bits) :Name:: Definition [3 1:01 ic-addr Address for data currently requested by IC ag. uis-dcc-addr iis-dccaddr Register Fields b m [31:0] dcc-addr Address for data currently requested by DCC ah. iisjpo-addr iispo-addr Register Fields Field~~bits. Name.. D fnto [31:0] po..addr Address for data currently requested by P0 ai. uis-burst uis burst Register Fields [13:0] Reserved [21:16] po...burst Burst lengtqh from P0 [13:81 dcc-burst Burst lenc-th from DCC ic-burst Burst Iena-th from IC aj. uis-base-addr uis base-addr Register Fields Fiel d~blts)Name- Deiito [31:12] the Base address of the coprocessor memory object coprocessor base in memory map. the coprocessor memory object [19:0] is aligned on a page boundary.

[11:0] Reserved Table 1.35 QIO) ak. uis test Table 1.36 uis-test Register Fields Table 1.37 NFrned.bi...).Name Definitio [31:4] Reserved test model 3:0] 0 IC ->EIC, P0 LMC 0 IC ->EIC, DCC LMC 0 PO- EIC, IC LMC 0 PO- ETC, DCC ->LMC 0 DCC ->EIC, IC ->LMC 0 DCC ->EIC, P0- LMC External Interface Controller Registers al. eic-cfg eic-cfg Register Fields bts Name....

0 reserved 1 enable Enables all EIC operation as a master on PCI and Generic buses.

2 bypass 3 reserved Enables the operation of one or more of the EIC modes.

5:4 pci-arb PCI Bus Arbitration: 00 Fair arbitration 01 IBus has priority 10 RBus has priority 11 Fair arbitration 6 pci-ibus ninrjen 7 pci rbus minlen 8 pci_mrl_mnn_en Enables use of PCI memory read line and memory read multiple modes.

10:9 gen-arb, 11 gen-clk 0 Generic bus clock is 1/4 of c Ik 1 Generic bus clock is 1/2 of cik 21:12 mmu-mask Mask bits that determine the page size used in the

MWU

29:24 hash func Determine the hash function used for page table Table 1.37 eic cfg Register Fields Table 1.38 hash_bypass if 1 then bypass the hash function completely, so that the page table index is taken from the bottom 13 bits of the virtual page number (regardless of page size).

31 mmu_bypass Forces the MMU to do null mapping on all requests.

am. eic_stat Note: bits in this register can change at any time.

eic_stat Register Fields Field(bits) Name Definition 0 ibus_pci_act Indicates an active request from the IBus to the PCI bus.

Srbuspci_act Indicates an active request from the RBus to the PCI bus.

2 mmu_act Indicates the MMU is in the middle of an operadon.

3 gen_act Indicates an active request to the Generic bus.

4 ibuspci_gnt Ibus granted to PCI bus rbus_pci_gnt Rbus granted to PCI bus 6 mmupcignt MMU service granted to PCI bus 31:4 Reserved an. eicerrint Error and interrupt bits of the eicerr _nt register can only be set by the EIC, and can only be reset by software. Normal error and interrupt bits are reset by writing a 1 to that bit Error bits which are copies of PCI configuration register bits must be cleared by writing to those registers writing the eic_err_int copy of the bit has no effect.

eicerr int Register Fields Field(blts) NameDein 0 page_fault Set when a page fault error occurs.

1 prot_fault Set when a protection fault error occurs.

2 gen_err Set when the Generic bus error pin is asserted for at least one gen_clk cycle.

3 gen_addr_err Set when a Generic bus burst request crosses outside the Generic bus memory region.

4 rwd_err Request when disabled set when the EIC receives an RBus or IBus request when its enable bit is zero.

target_aborterr A copy of the Received Target Abort bit in the PCI configuration space.

Table 1.39 Table 1.39 Table 1.40 a. eicerrint Register Fields Field(bits) Name .i Definition 6 master_abort_err A copy of -he Signalled Target Abort bit in the PCI configcurauon space.

7 reserved 8 data_parityexp A copy of the Detected Data Parity Error bit in the PCI configuration space.

9 gen_exp Set when 'he genexp_l pin is asserted for at least one cen_clk cycle.

23:10 reserved 24 gen_int Set when -he gen_int_l pin is asserted for at least one cen_clk cycle.

31:25 Reserved ao. eic err int en eic_err int Register Fields Field(bits) Name D.....efinition 0 page_fault Enables the corresponding error bit to cause the assertion of c_err.

1 protfault Enables the corresponding error bit to cause the assertion of c_err.

2 gen_err Enables the corresponding error bit to cause the assertion of c_err.

3 gen_addr_err Enables the corresponding error bit to cause the assertion of c_err.

4 rwd_err Enables the corresponding error bit to cause the assertion of c_err.

target_abort_err Enables the corresponding error bit to cause the assertion of c_err.

6 master_abort_err Enables the corresponding error bit to cause the assertion of cerr.

7 reserved 8 data_parity_exp Enables the corresponding error bit to cause the assertion of cexp.

9 gen_exp Enables the corresponding error bit to cause the assertion of c_exp.

23:10 reserved 24 genint Enables the corresponding error bit to cause the assertion cf cint.

31:25 Reserved ap. eic-test Table 1.41 eic-test Register Fields Table 1.42 Table 1.43 Table 1.44 Field(bt) .NmDeiti 31:0 Not yet defined aq. eicpob eicpob Register Fields Field~bis) gen pbi Value of the genric bus programmrable output pin pobi ar. eic-high addr eic-dual-addr Register Fields :Fiel d(bits NaeDfn0o 31:0 Whi chaddr Offset of 4GB region in host memory in which the jcoprocessor data structures exist (for dual address cycles).

as. eic-wtlb-v eic-wtlbv Register Fields D e 1:0 pt-jlags The flags asoiated with the TLB entry to be written.

11:2 Resrved 312 vpn TVirtual Pane number to be written or invalidated.

2, 14 at. eicwtlb_p Table 1.45 eic_wtlb_p Register Fields Field(bits) ii Name Defintio 0 inv_all Causes the entire TLB to be invalidated. The EIC clears this bit after performing the TLB operation.

1 inv_entry Invalidates a TLB entry with the virtual page number specified. The EIC clears this bit after perforring the TLB operation.

2 writelru Writes a TLB entry to the LRU location with the specified virtual page number, physical page number and control bits. The EIC clears this bit after performing the TLB operation.

3 write Write the TLB entry specified by the Entry Number field with the specified virtual page number, physical page number and flag bits. The EIC cle~'s this bit after performing the TLB operation.

7:4 ent_num Entry number to be written by Write Entry operation.

31:12 ppn Physica Page number to be written.

au. eic_mmu_v Note: values in this register can change at any time, unless the MMU is disabled by a page fault error or an MMU to PCI bus error.

*000 0 0* 6 00 o oo, 0000 Table 1.46 eic_mmu_v Register Fields 3:0 mmulru Current LRU location 4 mmu_hit mmu_hit is set when that last TLB access resulted in a hit without any page table access mmu_retry_hit v_mmuretry_hit is set when that last TLB access resulted in a hit after a page table access 11:6 Reserved 31:12 mmu_vpn The most recent virtual page number sent to the MMU for translation.

av. eic_mmu_p Note: values in this register can change at any ime, unless the MMU is disabled by a page fault error or an MMU to PCI bus error.

Table 1.47 eic_mmu_p Register Fields |X.Fij..bt)m..

31:0 mmu_lpta The most recent page table physical address fetched by the MMU.

aw. eic_ip_addr Note: values in this register can change at any tie-. unless the IBD is disabled by an IBus to PCI error.

Table 1.48 eic_ip_addr Register Fields Field(bits). Namei Defiition 31:0 libpa Physical address of the most recent IBus access to the PCI Bus.

ax. eic_rp_addr Note: values in this register can change at any time, unless the RBR is disabled by an RBus to PCI error.

Table 1.49 eic_rp_addr Register Fields 0* 0 0 0 0000 *000 0 ay. eic_ig_addr Note: values in this register can change at any time. unless the GBC is disabled by a Generic Bus error.

Table 1.50 eicig_addr Register Fields Fie0 its) Name 31:0 libea az. eic_rg_addr Note: values in this register can change at any time, unless the GBC is disabled by a Generic Bus error.

Table 1.51 eic_rg_addr Register Fields Field(blis) Name Definition 31:0 Irbga Address of the most recent RBus access to the Generic Bus.

PClbus Configuration Space Alias The PCIbus Configuration Space which consists of 16 words is aliased to the registers at addresses OxCO to OxCF.

Local Memory Controller Registers ba. Imi_cfg Table 1.52 Imi_cfg Register Fields 9 .9

S

Fielc (bts) Nam: Description [31:24] ref_interval Refresh interval in multiples of 4-clk periods [23:22] ro_prio RO access priority (3 highest) [21:20] pic_prio PIC access priority (3 highest) [19:18] ic_prio IC access priority (3 highest) [17:16] iisprio IIS access priority (3 highest) [15:13] rearb_interval Re-arbitration interval in words (2^n words) [12] mem_enable Memory enable (1 memory installed) [11] banks Number of DRAM banks connected 1 =2) iis_flush Flush the IIS prefetch data (self clearing) iisprefetch IIS prefetching enable refreshen Enable auto (CBR) refreshing of DRAM seamless Enable seamless SDRAM page faulting reserved bypass_mode Bypass mode select: 00 Rbus 01 Abus write 10 Abus read 11 Ibus S Self test mode B Bypass enable E Enable module Reserved This register contains many configuration and control bits used to define LMC operation mode and parameters. Bits that refer specifically to SDRAM operation have no effect when the sdram 1 pin is high.

The register has a reset value of 0x20000100 setting the refresh interval to 3.2 us at a clkin frequency of 80 MHz. All special modes and features are disabled at power up and all access priorities are equal and set to zero. Refreshing is enabled at reset, but the rest of the module is disabled Refreshing is not affected by the E bit.

r* 4.

I,

*9 9 .94.

2.1Q bb. Imistat Table 1.53 Imi_stat Register Fields 0 0.

o 4 o o .0*0 0 0 0000 0 0 0 Field(blts) Name escription [31] ro_ca RO module cycle active picca PIC module cycle active [29] reserved [28] iis_ca IIS module cycle active [27] ro_cp RO module cycle pending [26] pic_cp PIC module cycle pending reserved [24] iiscp IIS module cycle pending [23:22] Reserved [21:16] stateA Internal control state A [15:13] Reserved [13:8] stateB Internal control state B rd_active Reading DRAM wr_active Writing DRAM rf_active Refresh in progress rf_pending Refresh pending iis_pre_active IIS prefetch active Reserved sdram State of the sdraml input pin The status register contains module active and pending bits as well as internal state machine state information. The state machine is clocked at twice the Cbus interface rate, so two fields are necessary to hold the state information, one for each of the last two 80 MHz clock cycles.

All bits within this register are read only.

be. Imi err int Table 1.54 Imi_err int Register Fields .Field(blts) Name. .Description [31:24] interrupt Interrupt status bits [23:8] exception Exception status bits error Error status bits The error and interrupt status register holds interrupt, exception and error condition information. The register is read write where a read will return the status information and writing one to a particular bit will cause that bit to be reset. Writing a zero to any bit has no effect on that bit..

Table 1.55 Interrupt Bit Definitions Table 1.56 Bit Dese n 24 Refresh Interrupt. Occurs once per refresh interval (64 ms typ.) Refresh not serviced prior to subsequent refresh request Error Bit Definitions Bit .Descriptin 0 Access to DRAM when no DRAM enabled 1 Access to DRAM while module disabled 2 Rbus Address Error 3 Abus Address Error 4 Cbus Address Error Ibus Address Error .'i This register should have a reset value of 0x000000X0 indicating that no interrupts or errors are asserted. Reserved bits are always zero and will never change state.

bd. Imierr_int_en Register Table 1.57 Imi_errint_en Register Fields Field (bits) Name Description [31:24] int_mask Interrupt mask bits [23:8] expmask Exception mask bits err_mask Error mask bits The error, exception and interrupt enable register is used to selectively enable and disable error, exception and interrupt signals. The register is read write. This register is used to enable on a bit-by-bit basis each of the error, exception and interrupt signals in the Imi_err_int register. There is a one-to-one correspondence between the bits in this register and the bits in the Imi_err Int register. If a particular bit in the Iml_err_ nt en register is set high then the corresponding bit in the Iml_err int register will be enabled, and if it is high, the LMC module error, exception or interrupt output signal, c_err, c_exp or c int will be asserted. If a particular Imi err inten bit is cleared to zero then the corresponding bit in the Iml_err_int register is disabled and cannot cause the assertion of the c_err, c_exp or cint signal. Since there are no exceptions in the LMC, the exp_mask bits in this register have no effect and are all reserved.

This register has a reset value of 0x00000000 which disables all error and interrupt sources.

Unused bits are always zero and cannot be set high.

be. Imi_dcfg Table 1.58 Imi_dcfg Register Fields SField(b ts) Nam. Descip ion [31:29] row_bits Number of DRAM row address bits (n 6) [28:26) column_bits Number of DRAM column address bits (n 6) edodram EDO type DRAM (0 FP, 1 EDO) [24:22] precharge_enable Precharge enable address bit (n [21:19] precharge_bank Precharge bank address bit (n [18:17] caslo Number of CAS low clock cycles (CAS pulse width) (l to 4, 0 1) [16] cashi Number of CAS high clock cycles (CAS precharge) (1 to 2, 0 1) [15:13] ras_lo Minimum RAS low clock cycles (1 to 8, 0 1) [12:11] rashi Minimum RAS high clock cycles (RAS precharge) (1 to 4, 1) [10:9] ras_cas RAS to CAS delay in clock cycles (2 to 6, 0 2) cas lat SDRAM CAS latency in clock cycles: 0, 1= 1 clock 2 2 clocks 3 3 clocks *o 16:0] Reserved

I

This configuration register holds all the design parameters that determine the size and configuration of the DRAM chips used.

This register has a reset value of 0x0007FF80 which sets all timing constraints to their maximum values.

bf. Imi_mode Register Table 1.59 Imi_mode Register Fields Field Nam Des.ripon [31:14) Reserved [13] initialize Initialize SDRAMs (program mode register, self clearing) [12:0] sdram_mode SDRAM mode bits (written to SDRAM mode register over the address pins by initialize SDRAM command) This configuration register holds the information that is written into the SDRAM mode reeister as part of the initialization procedure. This register may be read or written at any time and may be written to the SDRAM by setting the initialize bit.

This register has a reset value of 0x0037. This is a useful default value that is required immediately after precharging at power up or after a level 1 reset. This sets read latency to 3 clocks and burst length to full page with sequential wrap.

220 After any reset, the initialize bit will be set if the sdram_l pin is low, to initially program the SDRAM mode register. After the mode register write is performed, this bit will be cleared to zero automatically.

Peripheral Interface Controller Registers bg. pic_cfg Table 1.60 piccfg Register Fields Field(blts N.me 0 reserved 1 enable Enables all PIC operation.

2 bypass 3 reserved 4 big.endian Causes all byte packing/unpacking to use bigendian order, i.e. bits 31:24 first, bits 7:0 last.

video mode 0 Video Output 1 Video Input 7:6 reserved 8 gate out clock Used in Video Output mode. Causes the output clock to be gated with vclk en in1.

9 inv_outclock Used in Video Output mode. Causes the output clock to be inverted with respect to vclk_in.

use_default_data Used in Video Output mode. If this bit is set, the value in the default_data register bit is driven onto the output data pins for cycles when data is not valid. Otherwise, the next valid data byte is driven if available.

11 default_data Used in Video Output mode. The default data used if use_default_data is enabled.

12 dataensource Used in Video Output mode. When 1, vdata_en_out_l is asserted when vdata_en_in_l is sampled asserted. Otherwise, vdata_en_out_l is asserted when vclk_en_inl is sampled asserted.

13 del_data Used in Video Output mode. Causes the output data to be delayed one cycle with respect to vdata_en_out_1.

14 gate_with_rdy Used in Video Output mode. Causes the output clock to be gated with vrdy_l.

reserved 16 forwardactdis Disables the assertion of c_active due to data in the output FIFO.

17 reverseactdis Disables the assertion of c_active due to data in the input FIFO.

18 forward_priority Relative priority of forward transfers when in a bidirectional mode.

a Table 1.60 pic_cfg Register Fields Field(bits Name Definition.

19 reversepriority Relative priority of reverse transfers when in a bidirectional mode.

forwardinvert data Invert output data signals 21 reverseinvert data Invert input data signals 22 forwardinvericontrol Invert output control signals 23 reverseinvert control Invert output control signals 30:24 cbus_timer Maximum ime for which a CBus cycle to the input or output data stream can be stalled before signalling an error. Specified in multiples of 8 clk cycles.

31 cbustimer disable Disables the operation of the CBus timer bh. picstat Table 1.61 pic stat Register Fields X' Field(bits) Name Definition- 0 abus_act Set when an ABus transaction is pending or in progress.

I rbus_act Set when an RBus transaction is pending or in progress.

2 reverse_act Set a when a reverse data transfer is active.

3 cent_cfg Copy of the external cent_cfg pin.

4 forwardfull Set when the PIC's output FIFO is full.

forwardsubword Set when the PIC's output FIFO has space for more than zero but less than four bytes.

6 forward_empty Set when the PIC's output FIFO is empty.

7 reserved 8 reversefull Set when the PIC's input FIFO is full.

9 reverse_empty Set when the PIC's input FIFO is empty.

reversesubword Set when the PIC's input FIFO contains more than zero but less than four bytes.

15:11 reserved 16. picplh The state of the picplh pin.

17 picackj The state of the picack pin.

18 picbusy The state of the picbusy pin.

19 picperror The state of the picperror pin.

picselect The state of the picselect pin.

21 picfaultj The state of the picfault_1 pin.

31:24 picdatain The state of the picdatain signal.

7bi. pic_errint Error and interrupt bits of the pic_err_int register can only be set by the PIC, and can only be reset by software. Each bit is reset by writing a 1 to that bit.

Table 1.62 picerr int Register Fields Field(bits) Name Definitio.n 0 forward_err Forward transfer error. Set if the PIC receives output data to transfer when configured for an inputonly mode.

1 rwd_err Request when disabled error. Set if the PIC is disabled when it receives request for an RBus transaction, or any register-initiated operation (ABus transfer, Centronics command, etc.).

2 timeout_err Peripheral timeout error.

8 reverse_exp Reverse transfer error. Set if software attempts to the coprocessort a reverse transfer when the PIC is in an output only mode.

9 cbus_exp Set when a CBus cycle to the input or output data stream times out When this bit is set, further CBus cycles to the input or output data streams are treated as reserved.

24 revcomp_int Set when the byte-count limit has been reached in a reverse transfer.

revdataint Set when data is available from a reverse transfer and there is no active bus transaction to indicate its destination.

26 abus_comp_int Set when abus transfer completes 27 timerint Set when timer 0 or 1 expires 28 comp_fault_int Set in Centronics compatible mode when the pic_faultl signal is asserted.

29 comp_perror.int Set in Centronics compatible mode when the picperror signal is asserted.

ecp_rev_req_int Set in Centronics ECP mode when the peripheral indicates that it has reverse data available.

31 no_peripheral_int No peripheral interrupt bj. pic_err_int_en pic_errint_en Register Fields 0 forward_err Enables the corresponding interrupt bit to cause the assertion of c_int.

I rwd_err Enables the corresponding interrupt bit to cause the assertion of c_int.

2 timeouterr Enables the corresponding interrupt bit to cause the assertion of c_int.

Table 1.63 Table 1.63 picerr_inten Register Fields Field(blts) Name: X Definltion 8 reverse_exp Enables the corresponding interrupt bit to cause the assertion of cint.

9 cbus_exp Enables the corresponding interrupt bit to cause the assertion of cint.

24 rev_comp_int Enables the corresponding interrupt bit to cause the assertion of cint.

revdataint Enables the corresponding interrupt bit to cause the assertion of c int.

26 abus_comp_int Enables the corresponding interrupt bit to cause the assertion of cint.

27 timerint Enables the corresponding interrupt bit to cause the assertion of c int.

28 comp_faultint Enables the corresponding interrupt bit to cause the assertion of cint.

29 comp_perrorint Enables the corresponding interrupt bit to cause the assertion of c_int.

ecp_rev_req int Enables the corresponding interrupt bit to cause the assertion of c_int.

31 no_peripheral_int Enables the corresponding interrupt bit to cause the assertion of c int.

bk. pic_abus_cfg pic_abus_cfg Register Fields 23:0 abcount Number of bytes remaining to transfer to/from the LMC. Set initially by software, and decremented by the PIC as each byte is transferred.

27:24 ab_byte_en Byte lanes to be used for ABus transfer 28 ab_type 1 Transfer is a read (from peripheral pot) 0 Transfer is a write (to peripheral port) 29 ab_the coproces- the coprocessorts the programmed ABus transfer.

sort This bit is cleared by the PIC when the ABus transfer has been completed. If cleared by software, the ABus transfer is terminated.

31:30 reserved Table 1.64 bl. pic_abus_addr Table 1.65 pic_abus_addr Register Fields Field(bits) Name iDe inition 31:0 ab_addr The byte address at which the next ABus transaction should be the coprocessoned.

bm. pic_cent_cfg The pic_cent_efg agister contains read/write control signals and read-only status signal control all aspects c- the interface when Centronics mode is enabled.

Table 1.66 pic_cent_cfg Register Fields Field(bits) Name Definition 2:0 cen_cmd Centronics Command: 000 Return to Compatible 001 Request Nibble 010 Transfer Device ID using Nibble 011-100 no-op 101 Request ECP 110 Transfer Device ID using ECP 111 Abort 3 cen_exe the coprocessorts execute of programmed Centronics command. This bit is reset when the Centronics command completes.

4 cen_sts This read-only bit shows the completion status of the previous Centronics command. A 1 indicates that the command was successful, a 0 that it was unsuccessful.

cen_mode Read-only bits showing current Centronics mode and operation based on the last negotiation: 000 Compatible 001 Compatible with Nibble enabled 010 Transferring Device ID using Nibble 011 Nibble Mode 100 reserved 101 ECP forward mode 110= Transferring Device ID using ECP 111 ECP reverse mode 8 cen_direct Bypasses the Centronics control logic and allows the software to directly control the output bits by writing and reading this register.

9 cenhostrec en Enables host recovery mechanism in ECP mode.

15:10 reserved 23:16 cen_tim Timer value, in clk cycles, for all Centronics setup, hold and pulse times.

31:24 cen_perjim Timer value, in lots of 64k clk cycles, when waiting for a Centronics peripheral response.

bn. pic_cent_dir Table 1.67 piccent-dir Register Fields to .6.

Fieldl(bits)'.' Nae 0 pic-data-oe Direct control bit for the pie-data-oe signal.

I pic-strobe-I Direct control bi t for the p i -s trobe_ 1 si inal.- 2 pic-autofdjl Di rect control bi t for the p ie_a utof d_ 1 sisnial.

3 pic-iniui1 Direct control bit for the p ic i t- 1 signal.

4 pic..selectinI Direct control bit for the pie seleetin 1 sianal.

picbuf en I Direct control bit for the pie buf-en 1 sional.

6 pic..buf..dir Direct control bit for the pic buf-dir signal.

7 reserved 15:8 pic..data..out Direct control bit for the pic-data_out signal.

31:16 reserved bo. pic-reverse-cf g pic reverse cf g Register Fields il~ bt 23:0 rev-count Number of bytes remaining to transfer from the external peripheral. Set initially by software, and decremented by the PIC as each byte is tras- 24 rev_use_count Causes the reverse transfer to be terminated after the specified number of bytes have been tr-ansrev-the coproces- the coprocessorts the programmed reverse transsort fer. If the rev -use-count bit is set, this bit is cleared by the PIC when the reverse transfer has been completed. The software can clear this bit to the reverse tansfer at any time.

31:26 reserved

I

Table 1.68 bp. pic-timerO Table 1.69 Table1.69picjimerO Register Fields 29, O bq. pic-timeri Table 1.70 pic-timeri Register Fields Data Cache Controller Registers br. dcc cfgl Table 1.71 dcc-cfgl Register Fields 00 V *0* Soo 6 0.04 4 as owes 0000 Table 1.72 Field~~bi... NaeDfinto E 0-disabled I =enabled 2 B 0=not bypassed I =by passed bs. dcc cfg2 dcc-cfg2 Register Fields 0 fAutoinv 0--not in auto-invalidate mode (value upon reset) 1 -auto-invalidate cache at the end of each instruc- _____tion Autof ill 0=not in auto-fill mode (value upon reset) I=autO-fill cache the coprocessorti ng at the address specified in dcc-addr. Cache is validated at the end of the operation. This bit is self-clearing,.

2 Lock 0-data is written to cache RAM after data fetch (value upon reset) 1 -data is not written to cache RAM after data fetch 3 always hit 0=Tag memory and valid bits are checked (value upon reset) 1 =Data is assumed to be always valid and resident in cache 4always miss 0=Tagy memory and valid bits are checked (value upon reset) I=Data is assumed to be not resident in cache Table 1.72 dcc_cfg2 Register Fields Field(bilts) N:ame Definition [10:8] mode current mode of caching operation: 0=random access- normal mode (value upon reset) 1 =JPEG Encoding 2=slow JPEG Decoding 3=single channel colour space conversion 4=multi channel colour space conversion matrix multiplication 6=64 bit mode 7=Invalidate all entries in cache. The DCC will revert to mode 1 when all the "line valid" bits have been cleared.

This field is reset at the end of each instruction.

11 cache_miss_inst current mode of caching operation: 0=Tag memory and valid bits are checked (value upon reset) S=Data is assumed to be not resident in cache This bit is reset at the end of each instruction.

bt. dcc_stat dcc_stat Register Fields error[3:0] error condition: bit 0=attempted R/W operation to cache or Tag memory with the module disabled.

state[7:0] internal state condition. Details to be determined bu. dcc err int dccerr int Register Fields Table 1.73 Table 1.74 0 error attempted R/W operation to cache or Tag memory with the module disabled.

by. dcc-err-int-en Table 1.75 dcc-err-int-en Register Fields Table 1.76 Table 1.77 Field(bts Name efinition 0 error-en enable corresponding error bw. dccIvO dccIvO Register Fields 131:01 lvO(31:O] valid bits for lines 31 down to0 bx. dcc-lvi dcc-lvi Register Fields am e 131:0] lvl[31:0] valid bits for lines 63 down to3 by. dcc_1v2 Table 1.78 dcc_1v2 Register Fields (31:0] lv2[3 1:01 valid bits for lines 95 down to 64 bz. dcc_1v3 Table 1.79 dcc_1v3 Register Fields 2Ida ca. dcc-addr Table 1.80 dcc-addr Register Fields Field~bt)Nm Definition 131:01 dcc-addr This is the base address register used for the special addressing modes. Note that different bits of this regrister are used depending on the operational mode.

I

cb. dcc-raddrb Table 1.81 dcc-raddrb Register Fields cc. dcc-raddrc Table 1.82 dcc-raddrc Register Fields cd. dcc-test Table 1.83 dc-test Register Fields Field (bits) Oli il i

I

drive_odara This bit is only valid when the test_mode bits are set to 0.

0--do not drive Operand Organiser data busses (value upon reset) 1 -drive Operand Organi ser data busses o-ackb This bit is only valid when the test_mode bits are set to 0.

This bit is only useable when the DCC is in its test mode and the drive odata bit is set. This bit is self-clearing.

0=do not assert o-ackb (value upon reset) I =assert o ackb for one ci k cycle

I

a.3o Table 1.83 dcc-test Register Fields .Field(bits) Name Deinition:: 2 a-ackc This bit is onldy valid when the test_mode bits are set toO0.

This bit is onldy useable when the DCC is in its test mode and the drive-odata bit is set. Th-is bit is self-clearinga.

O--do not assert oa ckc (val ue upon reset) I =assert o-a ck c for one ci1k cyc le [5:31 test-mode 0-drive odata busses mode(value upon reset) 1l-drive OOB address out to IIS, i-oe=0 2--drive OOC address out to IIS, i-oe=-O 3=drive IS data to odatab[(31:0O],i -oe=l 4=drive IS data to o datac[(31 i oe=1 Operand Organiser Registers Note that there are two identical Operand Organisers: Operand Organiser B and Operand Oreaniser C. The registers for these two Operand Organisers (which are identical) are described here.

ce. oon-cfg (oob cfg=0x70, ooc-cfg =0x80) Table 1.84 oon-cfg Register Fields Na e. e..pto Reserve Reserved cf. oon stat (oob cfg=0x71, ooccf g=x81) Table 1.85 oon-stat Register Fields m D es ri tio [31:24] Reserved [23:16] state-[7:O] internal state condition: bit 0 00 active bit 1 00 stalled (sequential mode only) bit 2 FIFO empty, bit 3 FIFO ful [15:0] Reserved cg. oon-err-int (oob err int=0x72, ooc-err-int=0x82) Table 1.86 oon-errjint Register Fields Field Name.Desc..ptio error..condition: reqes by.00.while.disabled bit andJPE.Coe.reqestng.at.siultneosl ch. oon~err.t.en......rr TableX rr.~e eise Fed a3 2 ci. oon_dmr (oob_dmr=0x74, ooc_dmr=0x84) Table 1.88 oon_dmr Register Fields F:ield Name Descript ion (31:30] Is3 lane swap for byte 3: 0 from byte 0 1 from byte 1 2 from byte 2 3 no swap [29:28] 1s2 lane swap for byte 2: 0 from byte 0 1 from byte 1 2 no swap 3 from byte 3 [27:26] Isl lane swap for byte 1 0 from byte 0 1 no swap 2 from byte 2 3 from byte 3 [25:24] IsO lane swap for byte 0: 0 no swap 1 from byte 1 2 from byte 2 3 from byte 3 [23:201 suben[3:0] Substitution enables: 0 do not perform substitution operation on this byte 1 use value stored in oon_subst for this byte [19:15] replicate Replication Count: indicates number of additional data items to generate [14:12] normalise Normalisation factor: 0 1 bit per channel 1 2 bits per channel 2 4 bits per channel 3 8 bits per channel 4 to 7 16 bits per channel [11] Reserved [10:8] bo[2:0] Bit offset within byte of bit object P External Format: 0 input objects are unpacked bytes 1 input objects are a packed stream if Internal Format: 0 pixels 1 unpacked bytes 2 packed bytes 3 other Table 1.88 oon-dmr Register Fields Fiel ame :Descrinption:: cc Input Channel Cou~t: 0 4 active channiels I 1 active channiels 2 2 active channiels 3 3 active channels L 0 immediate data in oo said register 1 direct addressing what Addressingy Mode: 0 bypass 1 sequential 2 tiling 3 constant data cj. oon-subst (oob-Subst=0x75, ooc-subst=0x85) oon-subst Register Fields Table 1.89 Table 1.90 [31:0] subst value of substitution data ck. oon-cdp (oob cdp=0x76, ooc cd p=0x86) oon-cdp Register Fields Fiel N a. [31:0] cdp current data pointer cl. oon-len (cobIen=0x77, ooc-len=0x87) oon-len Register Fields Table 1.91 Table 1.92 [31:0] len length of input operand streamn cm. oon-said (oob-said=0x78, occsaid=0x88) con_said Regis ter Fields Field ame [31:0] said the Coprocessont address or immnediate data cn. oon tile (oob-tile=0x79, ooc tile=0x89) Table 1.93 oon-tile Register Fields Field Namrre.Desciptio [3 1:16] offset[ 15:0] offset into operand [15:0] tile len[ 15:0) length -I in bytes, of operand for tiling operation Pixel Organiser Registers Co. pocfg Table 1.94 po-cfg Register Fields [26:24] burst[2:0] log, base 2 of maximum burst length for input data. Data bursts are aligned to addresses of this value.

[22:21] char. Number of input channels for JPEG compression: 0, 1 Single channel 2 =3 channels 3 =4 channels SS 0 =no subsamnpling 1 =perform subsarnpling [19] F Filter option for subsampling:C 0 no filtering (use every second byte) 1 apply filtering (average) [18:16] Reserved [15] dst destination for PBus data: 0 MDP I JPEG Coder (14:12] mode[2:0] Operating mode for PO: 0 idle I sequential mode 2 JPEG Compression 3 CSC 4 to 7= ConvolutiontImagye Transformation [11:4] Reserved S 0=not in self test mode I= self test mode bypassed B~ nbypassed [1]E I0 =disabled I =enabled Reserved 923 cp. po-stat Table 1.95 po stat Register Fields a. a a a Name.:I ntiion [31:27) Reserved [26] muv-miss 0 no MUV miss 1 MIJV m-iss po-stall 0 PO not staled I= current P0 operation stalled [24] po-active 0 P0 not active I= P0 active srnjhe copro- P0 the coprocessort state cessort [19] ack-rcvd ibus ack received (18] ibus.rtq-made ibus req made [17] fifojfull FIFO full [16] fifo-empry FIFO empty [15:0] Reserved cq. po_err_int poer-int Register Fields ci error error condition: bit 0 IBus i-ack asserted to P0 while disabled bit I both P0 and RO using MUV RAM simultaneously 2= jpeg, mode data overflow cr. po-err-int-en po-err-imt-en Register Fields err-mask error mask: bit 0 -IMus L~ack asserted to P0 while disabled bit 1 both P0 and RO using MUV RAM simultaneously bit 2 jpeg mode data overflow Table 1.96 Table 1.97 cs. po dmr Table 1.98 po_dmr Register Fields Fieldl Name Description [31:30] ls3 lane swap for byte 3: 0 from byte 0 1 from byte 1 2 from byte 2 3 no swap [29:28] ls2 lane swap for byte 2: 0 from byte 0 1 from byte 1 2 no swap 3 from byte 3 [27:26) Isl lane swap for byte 1 0 from byte O 1 no swap 2 from byte 2 3 from byte 3 [25:24] IsO lane swap for byte 0: 0 no swap 1 from byte 1 2 from byte 2 3 from byte 3 [23:20] suben[3:0] Byte Substitution Enables: 0 do not substitute data from po_subst register for this byte 1 use po_subst register value for this byte [19:15] replicate[4:0] Replication Count: indicates number of additional internal data items to generate [14:12] norm_factor[2 Normalisation factor for input data: 0 1 bit per component 1 2 bits per component 2 4 bits per component 3 8 bits per component 4 to 7 16 bits per component [111 Reserved [10:8] bo[2:0] bit offset within byte; Bit addressing is big endian P External format: 0 input data consists of unpacked bytes 1 input consists of a packed stream Table 1.98 podmr Register Fields Fil ame :::.:::Description ifT 1:0] Internal format of data passed to output o pixels I= unpacked bytes 2 packed bytes 3 other cc[l:0] Channel Count for input streamn o 4 active channels I= I active channel 2 2 active channels 3 =3 active channels L 0 imunediate operand ("short" format) 1 direct addressing ("long' format) what[l1:0] DMT1J addressing mode: 0 bypass 1 sequential 2 tilinQ 3 constant ct. po_subst posubst Register Fields C

C*

C C C. CCC.

C

C

a. C C

C.

C

0.

C, o ~00 Table 1.99 Table 1.100 31:0 subst[31:0] value of substitution data cu. pocdp po-cdp Register Fields .v len pole Register...Fields Field..Name..e.cr.p..o.

0 length. ofth .oern Table 1.101 cw. po_said Table 1. 102 po said Register Fields cx. poidr Table 1.103 pojidr Register Fields Fil am Des cIP. Ion:: I 2 rit1 A 6SS* 0S@O

S.

S S

S.

@50w S5 5

OSSS

9 S I iJ WIUUIL3 1:10] height[ 15:03 width 1, in pixels, of current image heigyht 1, in lines, of current imagye cy. po_muv-valid Table 1.104 pomuv-valid Register Fields I Fild Nam f escripio [3 1:0] valid Valid bits for MUV lines S. 9* 55 *5e5

S

005S cz. p0_muv Tablel1.105 pomuv Register Fields (3111]muv-base-addr base address of MUVRAM~.

Main Data Path Registers da. mdp..cfg All bits are reset to 0.

Table 1.106 mdpcfg Register Fields E 0 disabled =enabled 2 B 0=not bypassed =bypassed 3 T 0=not in self test mode =self test mode Table 1.106 mdp_cfg Register Fields Field Name.. Description 14 decode 0= Instnuction decoding disabled I Instruction decoding enabled: mdpop I and mdpop2 set up from mdpcfg (self clearing) operate the coprocessort bit (self clearing) 17 word-input 0 horizontal interpolation with byte inputs 1 horizontal interpolation with word input 18 longkrnl format of kemal discriptor 0 short format 1 long format 19 blendgen 0 blend generation not required 1 blend generation required 31:20 Instruc- Instruction major and minor opcodes tion[15:0] db. mdp_stat All bits are reset to zero Table 1.107 mdp_stat Register Fields Field Name Description 0 povalid status of 'povalid' signal I pofinal status of 'po_final' signal 2 po_stall status of 'po-stall' signal 3 oob valid status of 'oob._ack' signal 4 oobjreq status of 'oobreq' signal oobpendin 0 no outstanding requests in OOB interface 9 1 outstanding requests in OOB interface 6 oocvalid status of 'ooc ack' signal 7 oocjreq status of 'ooc req' signal 8 oocpendin 0 no outstanding requests in OOC interface 9 1 outstanding requests in OOC interface 9 ro _valid status of 'royvalid' signal rofinal status of 'rofinal' signal 11 rostall status of 'rostall' signal 12:13 matmulstat matrix multiplication state 0 idle 1 multiplying the left half of matrix 2 multiplying the right half of matrix 14:15 int stat[1:0] interpolation by fixed proportion states: 0 cycle 0 1 cycle 1 2 cycle 2 3 cycle 3 Table 1.107 mdp_stat Register Fields Field Name Description 6p ion 16 jump ramp generator mode (in blend generation) 0 step mode 1 jump mode 17:18 addgenstat state of the Address Generation state machine 0 idle 1 fetching operand from PO 2 generating address 19:20 ramp state state of rampgeneration state machine 0 idle 1 determine mode of operation 2 generating blend dc. mdp_err int All bits are reset to zero.

mdp errint Register Fields

N

Table 1.108 Field Name Description error[7:0] error[] receive data from PO when disabled or MDP is not the coprocessoned error[l] receive data from OOB when disabled or MDP is not the coprocessonrted error[2] receive data from OOC when disabled or MDP is not the coprocessorted 24:8 excep- exception[0] underflow or overflow in clamping in tion[15:0) channel 0 exception[ 1] underflow or overflow in clamping in channel exception[2] underflow or overflow in clamping in channel 2 exception[3] underflow or overflow in clamping in channel 3 exception[4] x co-ordinate underflow (image transformations and convolutions) y co-ordinate underflow (image transformations and convolutions) dd. mdp err mt -en All bits are reset to zero.

Table 1.109 mdp err_int_en Register Fields FedName. KDsrption 7:0err-mask[7:0 mask error condition 0 masked 1 not masked en-mask(0] receive data from P0 w.hen disabled or MIDP is not the coprocessorted err mask[1] receive data from 0013 when disabled or MDP is not the coprocessorted err-mask[2] receive data from OOC wvhen disabled or MDP is not the coprocessorted 24:8 expmask[1 mask exception 5:01 0 masked I not masked expjnask0J underfiow or overflow in clamping in channel 0 expjnask[1] undefflow or overflow in clamping- in channel 1 exp-mask[2) undefflow or overflowy in clamping in channel 2 expjrnask[3] underfiow or overflow in clamping in channel 3 expjnask[4] x co-ordinate underflow (imagye transformations; and convolutions) exp..mask[5] y co-ordinate under-flow (image transforand convolutions) a a de. mdpjest All bits are reset toO0 Table 1.110 mdp test Register Fields 16n: test-data[3:0] The source of data to RO under test mode 0-3 RO data is from PO data (setinga to 0, 2 or 3 would have the same effect) 4= RO data is from cob datat3 1:01 =RO data is from oob -data[63:32] 6= RO data is from oob-data[95:64] 7 =RO data is from cob data[ 127:96] 8 RO data is from oc-data[3 9 RO data is from ooc-data[63:32] RO data is from occdata[95:64] 11I ROdata is from ooc-dat a[127:96] 12-15 reserved 25:4 reserved .1.

Table 1.110 mdp test Register Fields Fied NmeDsci I outputjdeiayL 3:0] L

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31:30 1 skeletal-mod the number of clock cycles between input and output 2 mode of skeletal MDP 0 P0 to RO with some delay 1 P0 QOB OOC RO with some delay 2 the least significant byte of the data from P0, OOB and OOC are combined to give the result word to RO.

3 reserved df. mdpopl All bits are reset to zero mdpopl Register Fields Table 1.111

C

escrpti.

r ppbmodeA[2 mode of multi-function block A in Stae processinglc :0]Blc 1:9 ppbamodeB[2 mode of multi-function block B in Stae processinglc :0]Blc 1412pbamodeC[2 mode of multi-function block A in Stage A Processing Block 117:15 pba modeA[2 mode of multi-function block A in Stage B Processingy Block 20:18 pbb modeB[2 mode of multi-function block B in Stage B Processingy Block 23T2 1 _5pbb modeC[2 mode of multi-function block A in Stage B Processing Block Table 1.111 mdpopi Register Fields Fil ae~ .flsoription:.

27:24 inst type[3:O] Type of instruction: 0 no_op, (which implies that the MT)P does not for that instruction) 1 GCSC 2 reserved 3 Matrix Multiplication 4 Convolutions Image Transformation 6 reser-ved 7 Half Toningy 8 Residual merging 9 bypass (which implies that MT)P only needs to pass data from PO to RO) Horizontal interpolation I1= Vertical Interpolation 12-13 compositing 14-15 reserved 28 it mnt Interpolation required in Image transformation 0 no interpolation I= interpolation 29 it acc Accumulation required in Image transformation 0 no accumulation I accumulation comp unpre Un-pre-multiplication required in Compositing 0 no un-pre-multiplication I un-pre-multiplication 31 comp bed Blend generation required in compositing 0 no blend generation 1 blend generation dg. mdpopp2 All bits are rrset to zero.

Table 1.112 mdpop2 Register Fields F~ arn mu[lA[1 multiplicand of Operand A pixel 0=0

I=

2 =opacityB 3 =.-opacityB 3:2 mulB[1 multiplicand of Operand B pixel 0=0 1= 1 2 opacityA 3 -opacityA Table 1.112 mdp_op2 Register Fields r Fiel 1 d Name Description 4 reverse 0 do not reverse operand in compositing 1 reverse operand in compositing addgen_mod Address generation mode e 0 image transformation mode 1 convolution mode 6 self_cfg 0 long kernel descriptor 1 short kernel descriptor, other parameters are self configured 7 reserved 8 ag_the address generation the coprocessort bit. It is cleared when the coprocessort address generation is finished 9 bg_the blend generation the coprocessort bit. It is cleared when the blend coprocessort generation is finished.

mat_the matrix multiplication the coprocessor bit. It the coprocessorts the coprocessort matrix multiplication state machine inside the MDPH. It is cleared by that state machine when it sees the po_f inal signal asserted.

(Only valid for Matrix Multiplication instruction.) 11 int_the interpolation the coprocessort bit It the coprocessorts the interpocoprocessort lation state machine inside MDPII. Once the coprocessoned, this bit is set until the state machine sees po_final is asserted. (only valid for horizontal and interpolation instruction) 12 int_size 0 interpolate with packed bytes 1 interpolate with unpacked bytes or pixels (only valid for horizontal and vertical interpolation) 13 int_4 0 interpolate by a factor of 2 1 interpolate by a factor of 4 (only valid for horizontal and vertical interpolation) 14 int_vertical 0 horizontal interpolation 1 vertical interpolation 15 lock_step 0 the PO, OOB and OOC interfaces are operating independent of each other 1 the PO, OOB and OOC interfaces are locked together, so they will only accept data together.

19:16 reserved 21:20 cw_config[1: Clamp-or-wrapper configuration 0] 0 wrapped and no absolute value 1 wrapped and absolute value 2 clamp (overflow to OxFF, underflow to 0x00), but no absolute value 3 absolute value and clamp 22 fren Fraction Rounder configuration 0 disabled (returns 0) 1 =enabled Table 1.112 mdp_op2 Register Fields Field Nae scrpto 24:23 oob_mode(1: Mode of OOB interface operation: 0] 0 disabled 1 sequential 2 random 3 blendgeneration 26:25 ooc_mode[l: Mode of OOC interface operation: 0] 0 disabled 1 sequential 2 GCSC 3 pixel 30:27 trans[3:0] In Compositing operation 0 do not subtract offset for this channel 1 subtract offset for this channel In Colour Space Conversion operation 0 do not apply translation and clamping to output value on this channel 1 use translation and clamping on this output channel In Image Transformation or convolution operations 0 initialise accumulator to 0 for this channel 1 initialise accumulator to mdp_por0000 for this channel 31 reserved

C

dh. mdp_por All bits are reset to zero.

mdp_por Register Fields Table 1.113 offset0[7:0] offset for plus operator on channel 0 [15:8] offset offset for plus operator on channel 1 [23:16] offset2[7:0] offset for plus operator on channel 2 [31:24] offset3[7:0] offset for plus operator on channel 3 [31:0] offset[31:0] offset for convolutions and transformations di. mdp_bi All bits are reset to zero. The mdp bi register is used for different things in different modes: Table 1.114 mdp_bi Register Fields (compositing mode) Field N Description blendendO the coprocessort value of blend on channel 0 [15:8] blendendl the coprocessort value of blend on channel I ),46 B52 Table 1. 114 mdpbi Register Fields (compositing mode) Fied NmeDescoription: [23:16] blendend2 the coprocessort value of blend on channel 2 (31:24] blendend3 the coprocessort value of blend on channel 3 Table 1.115 mdpbi Register Fields (non-compositing mode) Fiel e D..escrip io n [31:2] ioffset offset into the index table dj. mdp-bm All bits are reset to ze-ro. The mdp bm regse sue ordfeettinsi ifrn modes: Ptri sdfrdfeetti~si ifrn Table 1.116 mdpbm Register Fields (compositing mode) ie dField blendendO end value of blend on channel 0 [15:8] blendendl end value of blend on channel 1 [23:16] blendend.2 end value of blend on channel 2 [31:24 blendend-3 end value of blend on channel 3 a. a Table 1.117 mdpbm Register Fields (non-compositing mode) S. rows[3:0] number of rows in the matrix cols[3:0) number of columns in the matrix [15:8] level number of levels in halftoning 20:16] bp[4:0] location of binary point dk. mdipjen All bits are reset to zero.

Table 1.118 mdplen Register Fields Fie 0 Name:: ecriptio 31:0 length length of blend to be produced JPEG Coder Registers dl. jccfg Table 1.119 jc-cfg Register Fields for JPEG instructions F.eld (Bts..Nae...rpt (31:28] mop Major opcode from instruction 00 [27] D 0 JPEG compress JPEG decompress [26] M 0 single colour channel 1 multiple colour channels 4 0 =three channel I four channel [24] S 0 do not use subsampling- regime 1 use subsampling regime [23] reserved [22] H 0 =use fast huffman algori thm use slow huffrnan algorithm (21:16]) reserved 0 0= JC is not operational I 1 =JC is operational (14) dec 0 disable decoding, of instruction I= enable decoding of instruction [13:8] reserved A 0 align rethe coprocessort markers to byte boundaries I align rethe coprocessort markers to word boundaries Z 0 =pad with Is pad with Os J_______reserved T 0 not inself test mode in self test mode B 0 not bypassed =bypassed 0 =disabled enabled reserved Table 1.120 jc-cfg Register Fields for data coding instructions 9.

I.

9 (31:28] 1 mop Major opcode ftrm instruction =00 [27) D 0 =compress 1 decompress [261 reserved [25:241 diff Difference between the number of input bytes and the number of output bytes: 00 no difference 01 one extra output byte than input byte 11 one less input byte than output byte [23] op operation: 0 huffman 1I= predictive code [22:19] reserved [18:16] ibo input bit offset [15] 0 0 =JC is not operational 1 JC is operational [14] dec 0 disable decoding of instruction 1 enable decoding of instruction [13:T] reserved Z 0 =pad withlis I pad with Os reserved T 0 not inseif test mode 1 in self test mode B 0 not bypassed 1 bypassed 1]E 0 =disabled enabled 10] reserved jccfg Register Fields for memory copy instructions J~ed( is ame I [31:28] mop Major opcode from instruction =100 1 [27] D 0 general purpose data movement 1 local DMA This bit should always be set to '0' [26]0 B= not a bit copy operation 1 bit copy operation 9~ 9 59 9 .9 9.

.9.9 =9 9 9 99 9. 9 9999 .9 9 Table 1.121 Table 1.121 jc-cfg Register Fields for memory copy instructions a 'a 9 (~aaa a. a a.

a a Fiel (Bis i Nam escription::*:: [25:24]) diff Difference between the number of input bytes and the number of output bytes: 00 no difference 1 01 =one extra output byte than input byte =11 one less input byte than output byte [23] reserved [22:20] obo output bit offset [19) reserved [18:16] ibo, input bit offset 0 0 =JC is not operational 1 JC is operational [14] dec 0 disable decoding, of instruction 1 enable decoding of instruction [13:4) reser-ved T 0 not inself test mode 1 in self test mode B 0 =not bypassed 1 bypassed 0 =disabled 1 enabled reserved din. jc-stat jcstat Register Fields a Field (Bits 1 [31:1] reserved [18] hufitabl obefi alifmse bl.Mrdha iehffa al c17]in huiserFfilldps leglmrerpsto [3161] resrve (161 uffIl_mnar illegal marker I ufker Table 1.122 Table 1.123 Table 1.123 Table 1.124 I. jcerr-int Register Fields Field (Bits ame:Dscip:o coeff-illAC illegal AC coefficient value (-1024) during [14] coeff-illDC illegal DC value [13] coeff-illAC illegal AC magnitucatgr mag [12]coeff illDC illegal DC magnitude category -mag [11]coeff-illRS illegal RSTm count value

T

coeff-overflo data overflow detected by coeff coder w coeff ill-mp illegal marker position jpeg...undeffl underfiow ow jpeg-disable received data while disabled error uffjll sym illegal huffman symbol er-ror bol do. jc-err-int-en jc-errint-en Register Fields Field (Bits x [31:19] reserved [18] huff:_ill-table illegal huffman table. More thin niine huffman table s heap misses occured.

[17] huff ill-mpo illegal marker position

S

[16] huff-ill_ma illegal marker ker coeff ill_AC illegal AC coefficient value (1024) durin~g [14] coeff-illDC illegal DC value (13] coeff-illAC illegal AC magnitude category .mag [12] coeff-illDC illegal DC magnitude category jnag [11] coeff-illRS illegal RSTm count value

T

coeff-overflo data overflow detected by coeff coder w coeff ill-mp illegal marker position os 18] jpeg-underfl underflow ow Table 1.124 Table 1.125 jcerr-int-en Register Fields [1]jpeg-disable received data wvhile disabled error d huff-lLsyrn illegal huffman symbol error I I bol dip. jc_rsi jcrsi Register Fields Table 1.126 Field Bits) ame [15:0] rsi number of IvICU blocks between rethe coprocessort markers dq. jc_decode jcdecode Register Fields (Bits). Dsrito [01 dct-enable enable dct submodule dct..bypass put dct submodule into bypass mode dct forward put dct into forward mode qdq...enable enable quantizer submodule [41 qdq-bypass bypass quantizer submodule qdqjforward put quantizer into forward mode qdqjour four channel image qda-subsmpl subsampled imagre cc~enable enable the coeff coder submodule cc-..bypass bypass coeff coder submodule cc-forward put coeff coder into forward mode [11]cc.jpeg code jpeg, compliant stream [12] cc..subsmpl [13] cc-fourchannel [14] cc-multichannel [151 hc-enable, enable huffman coder submodule [16] hc..bypass bypass huffman coder [17] hc forward put huffman coder into forward mode [18] hc..subsmpl subsaxnpled image [19] h~fastperform fast huffman coding hcjpeg perform jpeg compliant huffman coding [21] hc four our channel image Table 1.126 Table1.126jcdecode Register Fields Table 1.127 ciName [221 hc-aliafl alignl RSTM markers on word boundaries [23] hc..zeropad 0 pad using 's I pad usingy '0's [24] hc-memcopy perform memory copy operati on misc-forward [26] qdq..muld [27] hc-muti [31:22] reserved dr. jc-res jcj'es Register Fields res Residual value dls. jc-table-sel jcjtablesel Register Fields Fild(Bt). el deoedtbl.elcio..rq.niato jc~tablesel_ decoded table selection for buffrnan decoding huff Table 1.128 0P p p p.

p Result Organiser Registers dt. ro-cfg ro-cfg Register Fields Table 1.129 .ecrpin [3 1:23].res.rved .a .PE deomrese.otpt.at.frm 0, 1m Sing.e.channel 3-channel [22:21] JPE decopese aafomtu data frAma 3 Table 1.129 rocfg Register Fields in l' [19:18] reserved [17] usecut 0=-do not use value in cut register to cut output data.

l=use value in cut register to cut output data.

This bit is reset back to 0 on completion of an instruction.

[16] use-limit 0=do not use value in limit register to limit output data.

l=use value in limit register to limit output data.

This bit is reset back to 0 on completion of an instruction.

[15:14] Reserved [13:12] mode[1:0] Current mode of operation: 0 idle I sequential 2 JPEG decompression 3 CBus data [11:4] Reserved S 0 not in self test mode I self test mode B 0 not bypassed I bypassed E 0 disabled 1 enabled Reserved 00* 4 90*, I ,0 0 o* o** o

*VS.

go* *see *e du. rostat Table 1.130 rostat Register Fields [31:24] Reserved [23:16] state[7:0] internal state condition: bit 0 RO stalled bit I RO active bit 2 FIFO full bit 3 FIFO empty [15:0] Reserved dv. ro-err-int Table 1.131 ro-err mnt Register Fields Field Nm Deriton error error condition: bit 0 request when disabled bit 1I= both MlDP and JPEG Coder active at same Lime bit 2= illegal address error bit 3 jpeg mode data overflow dw. ro -err-int-en Table 1.132 ro-err-int-en Register Fields FieldNameDescriptin err-mask error condition mask enable corresponding error so w 0 *0 see*.

C

*Of,* dx. ro-dmr Table 1.133 ro-dmr Register Fields [31:30] Is3 lane swap for byte 3 0 from byte 0 1 from byte 1 2 from byte 2 3 no swap [29:28] 1s2 lane swap for byte 2: 0 from byte 0 I1= from byte 1 2 no swap 3 from byte 3 [27:26] Isi lane swap for byte 1: 0 from byte 0 1 no swap 2 from byte 2 3 from byte 3 [25:24] ISO lane swap for byte 0: 0 no swap 1 from byte 1 2 from byte 2 13 from byte 3 Table 1.133 ro_dmr Register Fields S.

*SSS

S

S

S.

*SS.

Field Name .esc. ription [23:20] suben[3:0] Substitution Enables: 0 do perform substitution for this byte 1 use value stored in ro_subst for this byte [19:16] wrmask Write Masks: 0 write out corresponding byte channel 1 do not write out corresponding byte channel cmbs Choose most significant bits O=choose least significant bits of a byte when performing denormalisation 1= choose most significant bits of a byte when performing denormalisation [14:12] normalise Denormalisation factor: 0 1 bit data objects 1 2 bit data objects 2 4 bit data objects 3 8 bit data objects 4 to 7 16 bit data objects 111:8] Reserved P External Format: 0 unpacked bytes 1 packed stream if Internal Format: 0 pixels 1 unpacked bytes 2 packed bytes 3 other cc Channel Count: 0 4 active channels 1 1 active channels 2 2 active channels 3 3 active channels Reserved dy. ro_subst Table 1.134 ro_subst Register Fields Field Name Description [31:0] subst[31:0] substitution value or data value for Cbus mode dz. rocdp Table 1.135 ro-cdlp Register Fields Field NameDescriptio [31:0] cdp[3 1:01 address of current data item ea. ro-len Table 1.136 ro-len Register Fields I Nae Decrition [3 1:0] len[31:0] Output Byte count eb. ro-sa ro-sa Register Fields Table 1.137 qil Nae J. Dsrpin aw [31:0] sa[31:01 the coprocessort address ec. ro-idr ro-idr Register Fields Table 1.138 I (3 1:01 height[15:0] height.- 1, in lines, of current image wId31:6 width 1, in pixels, of current image ed. ro-vbase Table 1.139 ro-vbase Register Fields [31:12] %,base[3 1:12] the coprocessor Virtual Address Base ee. ro-cut Table 1.140 ro-cut Register Fields 31:0 cut[3 1:0] output cut offset: throw this many bytes away ef. ro Imt Table 1.141 ro_lmt Register Fields ied ame.. Description lmt[31:0] lmt[31:0] limit to the number of output bytes PCI Configuration Space Alias PCI configuration space is a 256-byte block of registers defined in the PCI spec, which allows the host to configure the PCI device, and to read its status. It is accessed using PCI configuration cycles. The register contents are also mirrored into a read-only area of the coprocessor's internal memory space, so that they can be read via normal PCI bus memory cycles.

The format of the configuration space implemented in the EIC is shown in Figure 1.1 Figure 1.1 the coprocessor PCI Configuration Space Layout Ox14-0x28 Ox2C 0x30-0x38 Reserved registers, and reserved bits of implemented registers, will return 0 on reads and will not be affected by writes. Configuration space addresses in the range 0x40-OxFF are also reserved no vendor specific configuration registers are defined.

eg. Vendor ID This register is read only. CISRA's Vendor ID is Oxl lAC.

eh. Device ID This register is read only. the coprocessor's Device ID is 0x0001. The Device ID field is split up into two 8 bit fields: the most significant 8 bits is a number characteristic of the device (0x0 for the coprocessor) and the least significant 8 bits represents a version number of that device (Ox 1 for this version of the coprocessor).

ei. Command Register The definitions of the fields in the Command register are shown in Table 1.142. 411 nonreserved bits in this register are read/write. After reset, this register is set to 0x0000.

Table 1.142 the coprocessor PCI Command Register Fields Field(blts) gName Definitio 0 IO Space Reserved.

1 Memory Space Enables the coprocessor to respond to memory cycles.

2 Bus Master Enables the coprocessor to generate cycles on the PCI bus.

3 Special Cycles Reserved.

4 Memory Write Reserved.

Invalidate Enable VGA Palette Reserved.

Snoop 6 Parity Error Re- Enables the assertion of perr_l on data parity sponse errors, and serr_l on address parity errors (if bit 8 is also set). Also enables the setting of the Parity Error Detected bit in the Status register.

7 Wait cycle control Reserved.

8 serr_L Enable Enables the assertion of serr_l. the coprocessor will only assert serr_l on address parity errors.

9 Fast back-to-back Reserved.

Enable 10-15 Reserved Reserved.

ej. Status Register The definitions of the fields in the Status register are shown in Table 1.143. Reads to this register behave normally. Some bits of this register are read-only. The other bits can be set to 1 only by the coprocessor, and can be reset to 0 only by the host (except in test modes). The host resets a status bit by writing a 1 to that bit; writing a 0 to any bit has no effect. After reset, this register is set to 0x0280.

Table 1.143 the coprocessor PCI Status Register Fields 0-4 Reserved Reserved 66MHz capable Reserved.

6 User Definable Reserved.

Features 7 Fast Back-to- This bit is read-only, and set to 1. It indicates that Back Capable the coprocessor behaves correctly in a system where fast back-to-back cycles are addressed to different target devices.

Table 1.143 the coprocessor PCI Status Register Fields :NField(blts).) I Nam efinitlo 8 Data Parity Error This bit is set whenever the coprocessor, as a mas- Detected ter, detects a data parity error in read data, or detects perrl asserted on a write. It is only set if bit 6 of the command register is set. When this bit is set, an interrupt is signalled.

10-9 devsel_l tim- These read only bits are set to 01, to indicate that ing the coprocessor responds asserts its devsel 1 with medium speed when it is a target.

11 Signalled Target Reserved.

Abort 12 Received Target This bit is set whenever the coprocessor, as a mas- Abort ter, receives a target abort It causes the EIC to generate an interrupt, and to stop its operation until the bit is cleared by software.

13 Received Master This bit is set whenever the coprocessor, as a mas- Abort ter, executes a master abort. It causes the EIC to generate an interrupt, and to stop its operation until the bit is cleared by software.

14 Signalled System This bit is set whenever the coprocessor asserts Error serrl. This will only occur on an address parity error.

Detected Parity This bit is set whenever the coprocessor detects an S Error address or data parity error.

ek. Revision ID This is a read-only register. the coprocessor's initial revision ID is Ox01.

el. Class Code This is a read-only register. the coprocessor does not fit into any of the defined class codes of the PCI SIG, so this register is set to OxFFOOOO.

em. Cache Line Size This is a read/write register that specifies the cache line size of the system in 32 bit words. It determines when the coprocessor will use the Memory Read Line and Memory Read Multiple commands. the coprocessor supports any value from 0 to 255 in this register. A value of zero in this register disables the Memory Read Line and Memory Read Multiple command types. It is set to 0x00 on reset.

en. Latency Timer This is a read/write register that specifies the largest number of clocks the coprocessor can use for any PCI transaction, the coprocessor supports any value in this register from 0 to 255. It is set to 0x00 on reset.

eo. Header Type This read-only register is set to 0x00, indicating that the coprocessor uses a type 0 layout for the configuration space.

ep. Base Address This read/write register is used to locate the coprocessor's internal registers and memories, the local memory and the Generic Interface in the host's memory map. the coprocessor's various resources occupy 64 MBytes (not all locations are used), so only the top 6 bits of this register are writable. Tne remaining address bits are all hardwired to zero. The lower four bits of this register are read-only control bits, which are also hardwired to 0. This indicates that the register refers to memory space, that the coprocessor can be mapped anywhere in the 32-bit address space of the host, and that the coprocessor resources are not prefetchable when it is a target.

eq. Subsystem Vendor ID This read-only register allows the host to identify the vendor of a PCI board plugged into the system (as opposed to the vendor of the component implementing the PCI interface on the board). The contents of this register are loaded on reset via the serial configuration port on the EIC.

er. Subsystem ID The read-only register allows the host to identify a PCI board plugged into the system. The contents of this register are loaded on reset via the serial configuration pon on the EIC. This mechanism allows any required information about the board functionality or configuration to be encoded externally and read by the host es. Interrupt Line This read/write register is used by the system software to record interrupt line routing information so that it is accessible to interrupt service software. It has no effect on any operations in the coprocessor. It is set to Ox00 on reset.

et. Interrupt Pin This read-only register is hard-wired to 0x01, indicating that the coprocessor drives PCI interrupt pin inta_l.

eu. Min_Gnt This read only register indicates to the system the coprocessor's desired burst period length, in units of 1/4 microseconds. The optimum value for this register has not yet been determined.

ev. Max_Lat This read only register indicates to the system the coprocessor's desired maximum latency in gaining control of the PCI bus after a request, in units of 1/4 microseconds. The optimum value for this register has not yet been determined.

1.1.4 Internal Memory Map This section details the objects that appear in the per-module data areas within the the coprocessor internal memory map.

Table 1.144 the coprocessor Internal Memory Map uxuuuu- Ox 1 FFF reserved reserved Ox8000- EIC eic_ptp R/W MMU page table pointers Ox803F 0x8040- reserved reserved Ox807F Table 1.144 the coprocessor Internal Memory Map Byte*01 Oset oprocessor Ascae bao Mole amTyeDefit"on.

Ox 8080- ETC eic-addr Read CAM data with virtual and physi- Ox8OFF Only cal page numbers interleaved 0x8 100- reserved reserved 0xFFFF Ox 10000- LMC reserved Ox IFFFF 0x20000- PIC input RAM RIW 32 word x32 bit RAM in PIC input 0x2007F datapath 0x20080- PIC output RAM RIW 32 word x32 bit RAM in PIC out- 0x200FF put datapath 0x20 100- PIC reserved Ox2FFFF 0030000- MISC reserved Ox3FFFF 0x40000- IC prefetch-buf read Contents of Prefetch Buffer 40017 only 0x40018- IC reserved Ox4FFFF 0x50000 DCC cache RAM RIW 4k byte of 32 bit wide memory 0x51000 DCC tag RAM R/W 128 x20 bit tag memory -the Most significant 20 bits of the 32 bit word are used 0x52000 DCC dcc-odatabO R/W bits 31:0of o -datab bus. Ths value is driven on to the bus in the mode.

0x52004 DCC dcc-odatabi R!W bits 63:32 of o-datab bus. This value is driven on to the bus in the mode.

0x52008 DCC dcc_odatab2 R[W bits 95:64 of o -datab bus. This value is driven on to the bus in the mode.

0x5200c DCC dcc-odatab3 RIW bits 127:96 of o-datab bus. This value is driven on to the bus in the test mode.

0x52010 DCC dcc-odatacO R/W bits 31:0Oof o -datac bus. Ths value is driven on to the bus in the mode.

0x52014 DCC dcc-odatac I RIW bits 63:32 of o-datac bus. This value is driven on to the bus in the test mode.

Ox52018 DCC dcc-odatac2 RIW bits 95:64 of o datac bus. This value is driven on to the bus in the tet m de.

Table 1.144 the Coprocessor internal Memory Map yte Offset.

Aro the base1c eoul N eT p ein ito dcc-odatac., RJW bits 127:96of oda ta c bus. This value is driven on to the bus in the x000 P0muv-ram R/W iU V RA M. Te M V m OxO6 7FFappears in the sam e form at as the OxO6800 PO esevedInterval and Fraction RAM.

0x00000yj- P0B reserved OxFare reeeevved Ox9O2FC CD Bu iffer Uses only the least significant 12 bits. The most si.nfcn OX90100-are reserved.

Ox9O2Oc- y Jo ufra reserved, Ox9FFFF x0AOO0o-

MDP

**AOF Loso.nena tutrs OxCFFFIP reserved 2A3 1.1.5 Memory Word Fields a. eicptp Table 1.145 eicptp Memory Word Fields

I

Name 11:0 31:12 Resere rved Top 20 bits of physical byte address of the bottom of a 4kB segment of the page table.

a a

Claims (5)

1. A graphics processor for executing a computer instruction set comprising a plurality of instructions each of which has an instruction opcode and at least one operand, wherein a length of all the instructions is equal and of a like predetermined length, the opcode corresponds to a type of calculation to be performed on the operand(s), each operand is data to be processed in the calculation or specifies an address of the data, a result of the calculation represents processed image data, and each instruction includes a length field that includes data specifying a number of items of data to be processed or, if 1o the number exceeds a size of the length field, a predetermined location of a previously- allocated storage area at which the number is stored, and a flag indicating whether the number is stored in the storage area or the length field, whereby said processor for each instruction processes a corresponding number of data items to thereby facilitate processing of variable-length streams of data.

2. A processor as claimed in claim 1, wherein the time required to process said corresponding number of data items exceeds the time to fetch and decode each :g:instruction. :g o• 20 3. A processor as claimed in claim 1, wherein the number of operands per •*go instruction is selected from the range of integers between one and four. o.

4. A graphics processor for executing a computer instruction set comprising a plurality of instructions each of which has an instruction opcode and at least one operand, wherein the length of all said instructions is equal and of a like predetermined length, said opcode corresponds to a type of calculation to be performed on the operand(s), each operand is data to be processed in said calculation or specifies the address of said data, the result of said calculation represents processed image data, and each said instruction includes a length field containing data specifying a number of items of data to be processed or, if said number exceeds the size of said length field, a predetermined location of a previously allocated storage area at which said number is stored, whereby said processor for each said instruction processes the corresponding said number of data items to thereby facilitate processing of variable length streams of data. 413534D _claims.doc:eaa -265- A method of executing a computer instruction, wherein said computer instruction comprises an instruction opcode and at least one operand, said opcode corresponding to a type of calculation to be performed on said at least one operand, each said operand being data to be processed in said calculation or specifying the address of said data, and a result of said calculation representing processed image data, said method comprising the steps of: determining a number of items to be processed by said instruction, wherein said instruction includes a length field containing data specifying said number of items of data to be processed or, if said number exceeds the size of said length field, a predetermined location of a previously allocated storage area at which said number is stored, and a flag indicating whether the number is stored in the storage area or the length field; and .'•".processing said number of data items by said instruction to thereby facilitate go S: processing of variable length streams of data.

6. Apparatus for executing a computer instruction, wherein said computer instruction comprises an instruction opcode and at least one operand, said opcode corresponding to a type of calculation to be performed on said at least one operand, each said operand being data to be processed in said calculation or specifying the address of said data, the result of said calculation representing processed image data, said apparatus 20 comprising: means for determining a number of items to be processed by said instruction, •wherein said instruction includes a length field containing data specifying said number of items of data to be processed or, if said number exceeds the size of said length field, a predetermined location of a previously allocated storage area at which said number is stored, and a flag indicating whether the number is stored in the storage area or the length field; and means for processing said number of data items by said instruction to thereby facilitate processing of variable length streams of data.

7. A computer readable medium comprising a computer program for executing a computer instruction, said computer instruction having an instruction opcode and at least one operand, said opcode corresponding to a type of calculation to be performed on said at least one operand, each said operand being data to be processed in said calculation or specifying the address of said data, the result of said calculation representing processed 35 image data, said computer program comprising: 413534D _claims.doc:eaa -266- code for determining a number of items to be processed by said instruction, wherein said instruction includes a length field containing data specifying said number of items of data to be processed or, if said number exceeds the size of said length field, a predetermined location of a previously allocated storage area at which said number is stored, and a flag indicating whether the number is stored in the storage area or the length field; and code for processing said number of data items by said instruction to thereby facilitate processing of variable length streams of data. DATED this Seventeenth Day of August, 2001 Canon Kabushiki Kaisha :Patent Attorneys for the Applicant SPRUSON FERGUSON 0 *0 0 0 0@ 0 0 000 0: 413534D1 claims.doc:eaa