JPS61502846A - デ−タベ−スのバックアップの方法 - Google Patents
デ−タベ−スのバックアップの方法Info
- Publication number
- JPS61502846A JPS61502846A JP60503226A JP50322685A JPS61502846A JP S61502846 A JPS61502846 A JP S61502846A JP 60503226 A JP60503226 A JP 60503226A JP 50322685 A JP50322685 A JP 50322685A JP S61502846 A JPS61502846 A JP S61502846A
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- G—PHYSICS
- G06—COMPUTING; CALCULATING OR COUNTING
- G06F—ELECTRIC DIGITAL DATA PROCESSING
- G06F11/00—Error detection; Error correction; Monitoring
- G06F11/07—Responding to the occurrence of a fault, e.g. fault tolerance
- G06F11/14—Error detection or correction of the data by redundancy in operation
-
- G—PHYSICS
- G06—COMPUTING; CALCULATING OR COUNTING
- G06F—ELECTRIC DIGITAL DATA PROCESSING
- G06F11/00—Error detection; Error correction; Monitoring
- G06F11/07—Responding to the occurrence of a fault, e.g. fault tolerance
- G06F11/14—Error detection or correction of the data by redundancy in operation
- G06F11/1402—Saving, restoring, recovering or retrying
- G06F11/1446—Point-in-time backing up or restoration of persistent data
- G06F11/1448—Management of the data involved in backup or backup restore
- G06F11/1451—Management of the data involved in backup or backup restore by selection of backup contents
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- H—ELECTRICITY
- H04—ELECTRIC COMMUNICATION TECHNIQUE
- H04Q—SELECTING
- H04Q11/00—Selecting arrangements for multiplex systems
- H04Q11/04—Selecting arrangements for multiplex systems for time-division multiplexing
- H04Q11/0407—Selecting arrangements for multiplex systems for time-division multiplexing using a stored programme control
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- Y—GENERAL TAGGING OF NEW TECHNOLOGICAL DEVELOPMENTS; GENERAL TAGGING OF CROSS-SECTIONAL TECHNOLOGIES SPANNING OVER SEVERAL SECTIONS OF THE IPC; TECHNICAL SUBJECTS COVERED BY FORMER USPC CROSS-REFERENCE ART COLLECTIONS [XRACs] AND DIGESTS
- Y10—TECHNICAL SUBJECTS COVERED BY FORMER USPC
- Y10S—TECHNICAL SUBJECTS COVERED BY FORMER USPC CROSS-REFERENCE ART COLLECTIONS [XRACs] AND DIGESTS
- Y10S707/00—Data processing: database and file management or data structures
- Y10S707/99951—File or database maintenance
- Y10S707/99952—Coherency, e.g. same view to multiple users
- Y10S707/99953—Recoverability
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- Information Retrieval, Db Structures And Fs Structures Therefor (AREA)
- Techniques For Improving Reliability Of Storages (AREA)
Abstract
(57)【要約】本公報は電子出願前の出願データであるため要約のデータは記録されません。
Description
【発明の詳細な説明】
発明の名称
データベースのバックアップの方法
技術分野
本発明は中央計算機と、中央計算機メイン・メモリと、中央計算機大容量メモリ
と、複数個の周辺データベース・メモリを有する分散データベース・システム(
(おいて、周辺データベース・メモリの各々の内容のバックアップ・コピーを中
央計算機大容量メモリ中に生成する方法にどのようなデータベース・システムに
あってもシステム中の記憶された情報の内容のバックアップ・コピー、即ちダン
プを周期的え生成することが必要とされる。これはデータベース中の記憶された
情報が典型例では時間と共に変化することによる。ある時点匠おけるデータベー
スの内容のバックアップ・コピーがあれば、データベースを駄目にするような障
害が生じた場合、バックアップをとった時点において存在した状態にデータベー
スを戻すことが出来る。
データベースのバックアップをとる古典的な方法は、データベースに対する変更
を禁止し、次いでデータベースの情報全体を直接バックアップ・ディスクまたは
テープの如き大容量メモリ上にコピーするようなシステム状態を形成する方法で
ある。不幸にして、多くの型のデータベースにあっては、この方法を用いるとユ
ーザがシステムを利用出来なくなるという大きな欠点が生じる。例えば、カウニ
ツツおよびエカートの1データベースのバックアップ・・・・・・極めて大規模
なデータベースの問題点σと題するオーストラリアン・コンピュータ・ジャーナ
ル、第13巻、第4号(1981年11月りの論文によると、10億バイト以上
のデータベースのバックアップをとるのに必要な時間および資源はデータベース
のユーザにとって大きな問題となっている。
分散データベースのバックアップが単一の資源、例えばディスク上で生成される
場合には小さな分散データベース・システムでも類似の問題が生じ得る。分散デ
ータベース間の通信チャネルが低速であるかまたは輻棲していると、各々のデー
タベース・サイトの全バックアップをとるのに必要な時間は大規模な中央化され
たデータベースの場合と同程度となり得る。従って、古典的なダンプ法には固有
の欠点が存在することになる。
カウニツツおよびエカートの前述の論文はデータベースのバックアップの問題点
を解決するために提案された幾つかの技法について調査を行っている。この論文
によると、あるシステムでは手間のかかる動的バックアップ機構を提供しており
、それによってデータベースのバックアップは通常のユーザ処理(データベース
情報の変更を含む)と並行して行えるようKなっている。この技法にあっては、
所定の時刻に完了したバックアップは通常データベースの完全な状態を表わして
いないので、バックアップ・ファイルから再ロードされたデータベースを論理的
に矛盾のない完全な状態にするため他の手段を使用しなければならない。これを
行う典型的な方法は変更が生じたときにデータベースに対する監査痕跡を保持す
スを再ロードした後、バックアップ・ファイルをとった初期の時点からデータベ
ースに障害が生じた時点まで監査痕跡を再処理する必要がある。次いで障害が生
じた時点において進行中であった変更を何らかの操作により取除かねばならない
。明らかにこれは費用のかかる複雑な方法である。
カウニツツおよびエカートはまた古典的なバックアップ技法に対する代案として
差分バックアップ法について言及している。データベースは多数の一定の大きさ
のページより成るものと見做されている。最初にデータベースの完全なバックア
ップがとられる。その後、データベースに対する変更がなされるときに影響を受
けたページに従ってビット・インディケーションがビット・マツプ中に加えられ
る。その結果としてビット・マツプにより示される変更を受けたページのみをセ
ーブすることによりバックアップ差分ファイルが生成されるλこの差分バックア
ップ・ファイルは最後の差分バックアップ後に変化したページで周期的に更新さ
れる。ある時点において、差分バックアップ・ファイルは完全なバックアップ・
ファイルとマージされるか、または新しい完全なバックアップがとられる。
前述の差分法はまたある問題が存在する。第1に別個の差分バックアップ・ファ
イルが完全なバックアップ・ファイルに加えて保持されていなければならないこ
とである。データベースを再構築しなければならない場合、完全なバックアップ
を再ロードして、−次いで差分ファイルとマージしなければならない。第2に、
バックアップ処理の期間中システムは更新できないことになる。
発明の概略
前述の問題点は本発明に従い、周辺データベース・メモリの各々の内容のバック
アップ・コピーを生成する方法により解決される。本方法は周辺メモリの各々に
対し第1の更新パスを1回またはそれ以上逐次実行し、第1のパスは該第1のパ
スの実行期間中に所定の時刻においてバックアップがとられている周辺メモリに
対する更新変更を許容する状態を形成することを含み、所定の時刻においてバッ
クアップがとられている周辺メモリのすべての変更を逐次中央計算機に、次いで
大容量メモリに送信し、各々の周辺メモリ上で第2の更新パスを逐次実行させ、
該第2のパスは所定の時刻において更新されている周辺メモリに対する更新変更
を許容しない状態を形成することを含み、最後に第1のパスを実行した後にバッ
クアップのとられている周辺メモリに対してなされたすべての付加的変更を中央
計算機に、そして大容量メモリに逐次送信するステップより成る。
本発明の好ましき実施例を個々のデータベースと中央プロセッサの間の低速通信
チャネルを含む分散データベース・システムに関して示す。このシステムはバッ
クアップを生成するのに必要な時間に関しては、バックアップ時間が問題となり
得る大きなデータベースと等価であると見做すことが出来る。2つのパスが好ま
しき実施例では実行される。個々のデータベースは各パスの期間中に逐次バック
アップがとられる。所定の時刻においてバックアップのとられる個々のデータベ
ースは最後のパスの期間中変更に対してロックされる。これにより分散データベ
ースが全体として、バックアップをとるのに必要なほとんど全時間期間中にあっ
ても、ユーザの利用を可能とすることが保証される。
図面の簡単な説明
第1図は本発明を実現するのに使用される中央プロセッサおよび1つまたはそれ
以上の交換機モジュールを含む計算機制御された分散電話システムのブロック図
、第2図は交換機モジュールと関連するデータベース・メモリをページに分割す
る仕方、ならびにメモリのバックアップ・コピーを最後に生成して後に修正され
たメモリのページを記録するためのビット・マツプの使用法を示す図、
第3図はバックアップ生成期間中に中央プロセッサを制御するのに使用されるメ
イン・バックアップ・プログラムのフローチャート、
第4図は第3図のメイン・プログラムによって呼び出されるバックアップ・サブ
ルーチンの詳細なフローチャート、
第5図は交換機モジュールの各々にあるメモリ中に存在するバックアップ・プロ
グラムの詳細なフローチャート、
第6図は交換機モジュールによってバックアップ・プロセス期間中に中央プロセ
ッサに送信された差分バックアップ・メツセージのフォーマットである。
詳細な説明
第1図は分散配置された扁5電子交換電話システムの簡単化されたブロック図で
ある。このシステムは本発明の詳細な説明するのに使用される。基本的にはこの
システムは1つの中央プロセッサ100と1つまたはそれ以上の交換機モジュー
ル102−1〜102−Nより成る。
図示のシステムにおいて、中央プロセッサ100は一般に市販されるプロセッサ
である。このプロセッサは資源の割当て、保守および記録保存のための操作支援
システムとのインタフェース等々を含む中央化知的処理を必要とする機能を実行
する。
中央プロセッサ100は交換機モジューノ呟メツセージ交換機104および時分
割多重交換機106に接続されている。メツセージ交換機104は中央フロセッ
サ100と交換機モジュールの間ならびに交換機モジュール自身の間の制御メツ
セージの経路を決定する。これらのメツセージは時分割多重交換機106を通っ
て運ばれる。
交換機モジュール102は殆んどの呼処理機能を提供するマイクロプロセッサに
より制御されたユニットでるる。該モジュールはシステムと電話機108ならび
にトランク1100間のインタフェースを提供する。各々の交換機モジュールは
交換機の第1ステージの機能を実行するタイムスロット入替えユニットを含んで
いる。複数個の交換機モジュールの接続が時分割多重交換機106によって提供
される。−
中央プロセッサ100はランダム・アクセス・メモリ112と関連しており、こ
のメモリの1部はCPデータベース114となっている。このデータベースはc
Plooによって実行される機能に対する中央化されたアクセスを要求する交換
局に依存するデータおよび利用者データの如き項目を含んでいる。交換機モジュ
ール102−1〜102−Nの各々はまた別個のランダム・アクセス・メモリ1
16−1〜116−Nと関連しており、そのメモリの一部は交換機モジュール・
データベース(SMDB)118−1〜118−Nとなっている。
このSMDBは典型例では電話機およびトランク端子の如き交換機モジュールに
個有の交換局に依存するデータならびに交換機モジュール(SM)によってサー
ビスを受けている電話機に特有のデータを含んでいる。cpデータベース114
および8Mデータベース118はシステムの分散配置されたデータベースを構成
している。
CPlooはまたディスク・メモリ、1o3と関連しており、該メモリは分散配
置されたデータベースの最も最近のバックアップ・コピーを記憶するのに使用さ
れる。
各々の3Mメモリ116の他の部分はビット・マツプ大きさのページに概念的に
分割されている。図示の実施例ではページは128バイトの長さを有している。
利用者が起呼を行うような変更がSMD8118に対してなされるとき、111
がこの変更を含むページを規定するビット位置の適当なビット・マツプ中に加え
られる。この様子が第2図に示されている。即ち図ではワード0〜Pを有するビ
ット・マツプが示されており、各々は10ビツトを有するものと仮定している。
ビットマツプの右側にidsMDBのページ・レイアウトが示されている。
図示の如く、ビットマツプの第1のビットはデータベースのページ0と関連して
いる。ワード0の最右端のビットはページ9と関連しており、これは11′にセ
ットされているが、それてよって最後のバックアップ・コピーがとられた後にペ
ージ9が変更されたことを示している。
以下で述べるプログラム制御機能は簡潔を旨とし理解を助けるため単純化してい
る。例えば第3〜5図のフローチャートは当業者にあっては周知のプログラムの
フロー中の実時間ブレークの如き事項は無視して描いている。
データベースのバックアップは周期的(例えば1日1回)K実行しても良いし、
例えばシステムの操作者からの要求に応じて実行しても良い。いずれの場合でも
バックアップを開始するためて第3図のCPlooのプログラム・アドレス5T
ARTに入ることになる。5TARTはバックアップ制御プログラムである。基
本的には該プログラムは交換局内の各々の5M102に対し第4図に示すバック
アップ・サブルーチンの連続的実行を制御する。交換局のすべてのSMにおいて
バックアップ・サブルーチンが完了する毎に、1つのパスが完了したと言われる
。少なくとも2つのパスを、そして必要に応じてそれ以上のパスを実行すること
が可能である。本発明に従い、8Mデータベース118中匠おいて変更が生じる
ことが許容され、最後のパスを除くすべてのパスの期間中にバックアップが実行
される。その結果、多数の変更がCPloo、従ってディスク103に送信され
ることが期待される初期のパスの期間中、SMD8118は尚変更し得る状態に
ある。最後のパスの期間中、直前のパス以後vc(もし存在するならば)8Mデ
ータベースに生じた2、3の変更を送信するのに要求される極めて短い時間期間
だけ8Mデータベースの変更のロックアウトが生じる。変更されたページが各々
のSMDBから逐次送信されるので、1つのパス期間中に既に検査されたページ
位置の8Mデータベース(例えば118−1)K対して生起する変更は該データ
ベース上において次のパス期間中にバックアップされる。
図示のシステムにあっては2つのパスを用いるなら変更のロックアウト時間を満
足すべき値に減少させることが分っているが、第3図には説明の便宜上3つのバ
ックアップ・パス1〜3が示°されている。第3図において、ステップ300は
パス・インディケータをパス1にセットする。ステップ302および304は該
パスがすべてのSM上で実行されるまで交換局の各々のSMに対しバックアップ
・サブルーチンBACKUPを逐次呼び出す。
この時点でステップ306.308および310はパス2をすべてのSM上で実
行し、パス10期間中には遅く到着したため含められなかった8Mデータベース
に対する変更をバックアップする。本発明に従い、ステップ310ICよってバ
ックアップされた変更の数はステップ304によってバックアップされた変更の
数よりずっと少ない。
ステップ310がすべてのSM上で実行された後、ステップ312はパス・イン
ディケータをパス3にセットする。ステップ313はCPメモリ112中のイン
ディケータをセットしてCPデータベース114に対する変更をロックアウトす
る。これを行う理由は、あるCPデータベース変更は関連する変更を3Mデータ
ベース中で生じさせるためである。パス3のバックアップを実行しているSMに
対しては変更は許容されないので、CPデータベースに対する変更もまた禁止さ
れねばならない。
ステップ314およ−び316はこれにより5M102の各々π対しバックアッ
プ・サブルーチンを逐次実行する。最後のSMが完了したとき、ステップ318
はcpデータベース全体をディスク103にコピーすることによりCPデータベ
ース114をバックアップする。CPデータベースとCPlooの間には低速通
信チャネルが存在せず、ただ1つのCPデータベースが存在するのみなので、各
パスにおいてCPデータベースをバックアップする必要はない。ディスク103
中VCCPデータベースのバックアップを生成する速度は本実施例にあっては極
めて長い時間変更をロックアウトしない程十分速い。
しかし、事情が許す場合にはこの問題を回避するために各パスにおいてCPバッ
クアップを生成し得ることに注意されたい。
CPデータベースのバックアップが完了した後、ステップ320はメモリ112
中のCPロック・インディケーシヨンをリセットすることによりデータベースの
ロックを解除する。この時点でバックアップは完了する。この時点で存在するC
Pデータベースのコピーおよび各々のデータベース上にパス3の完了時点で存在
した各8Mデータベースのコピーがディスク103中に存在することになる。
第4図はcpiooの動作を制御するBACK[Jpサブルーチンの詳細を示し
ている。ステップ400はパス3が進行中かどうかを決定する。もし進行中でな
いと、更新ロックアツプは動作せず、ステップ402によりCPlooはバック
アップ警報メツセージをSMに送信し、該SM上でこのパスが実行される。この
警報メツセージはパス1および2に対する10ツク解除1フラグを含んでいる。
他方、パス3が実行されていると、ステップ404は10ツク1フラグを含む警
報メツセージをSMに送信する。第5図はcpiooからの制御メツセージに応
動して5M102中のマイクロプロセッサを制御するプログラムの詳細を示して
いる。アドレス指定されている5M102中のステップ504はCPlooから
の警報メツセージを認識する。ステップ506はデータベースの変更をロックア
ウトする要求を警報メツセージが含んでいるか否かを決定する。もし含んでいる
場合には、ステップ508はロックアウト状態とする。いずれの場合でも、ステ
ップ510は次にパスを開始させる準備がすべて整ったというアクノリジ(AC
K)メツセージをcpiooに返送する。
cpiooのプログラム中のステップ406はACKメツセージの受信を認識し
、それによってステップ408によりバックアップ開始メツセージをSMに送信
する。再び第5図に戻ると、ステップ502は開始メツセージを認識する。これ
に応動してステップ512はビット・マツプ探索ポインタをセットしてビット・
マツプの始めから開始させる如きある種の初期化機能を実行する。ステップ51
4は第2図に示すビット・マツプの探索を開始させ、ページの変更を示す次のl
“の位置を見出す。11 “が見出されないと、ステップ516および530
により1終了“フラグがセットされたメツセージを発生し、CPlooに送信す
る。ステップ534はcpiooからのこれに応動したACKメツセージを探索
し、該メツセージが受信されるとS MSTARTプログラム動作を終了させる
。他方、最初の′1 ”が見出されたものと仮定すると、ステップ520はビッ
ト・マツプ中の11〃の位置を適当な3Mデータベース118中のページ・アド
レスに翻訳する。ステップ528は最初の′ 1 “と関連するページを10″
にセットされた終了フラグ(未終了の状態を表わす)と共にcpiooに送信す
る。ステップ532はCPlooからのアクノリジ(ACK)メツセージを待機
し、ACKメツセージが受信されるとビット・マツプ中の次の1 ′の位置を決
めるためにステップ514に戻る。この過程はビット・マツプ中に示すすべての
変更されたページがCPlooに送信されるまで継続される。
SMバンクアップ・プログラムに関する以上の記述は実際に好ましいと考えられ
るプログラムより幾分簡単化しである。第1図で述べた特定のシステムにあって
は、第5図に示すように1時に1ページではなく、CPからの7クノリジ(AC
K)メツセージを待機することなく1時に5ページまでの変更されたページをC
Plooに送信する方が効率的である。しかしこれは特定のシステム環境に応じ
て変化するものであり、第5図を適当に修正したものも当業者てらっては容易に
考案し得る。
第4図に示すCPlooのプログラムを再び参照すると、ステップ410はある
パス中でそのとき活性状態にあるSMから変更されたページの伝送を受信する。
ステップ411HACKメツセージに応動してアクノリジメント(ACK)メツ
セージをSMに返送する。ステップ412はメツセージ中の1終了′フラグをテ
ストし、このSMに対するこのパスにおいてバックアップが完了したかどうかを
決定する。フラグがセットされていないと、メツセージは1ページのデータを含
んでいることになる。
ステップ414はディスク103上に存在する以前のバックアップ・コピー中に
そのページをマージする。次にこのSMに対する処理はステップ410に戻る。
他方、ステップ424Hこのとき完了したSMにデータベース更新ロック解除メ
ツセージを送信する。このメツセージは第5図の8Mプログラムのステップ50
0でデコードされ、ステップ501により3Mデータベースに対する変更のロッ
クが解除される。このステップは実際には最後のパス(パス3)に対してのみ有
効である。何故ならばそれ以前のパスに対しては更新は既にロックが解除されて
いるからである。
再び第4図に戻ると、ステップ426にお層てcP100バックアップ・サブル
ーチンはロック解除メツセージの送信後メイン・プログラム中のステップ304
.310または316の適当な点に戻る。
以上述べたことより、3Mデータベース118はバックアップの全期間を通じて
ユーザによる更新が可能であることが理解されよう。最後のパス(パス3〕の期
間中においてさえ、バックアップされつつるる3Mデータベースのみが更新に対
してロックされている。更に、差分バックアップ、即ち変更されたページのみを
送信し、差分更新を恒久バックアップ・ディスク・コピー中にマージすることに
より処理に必要なデータ量は従来の全コピー法に比べ大幅に減 する。
前述の装置は単に本発明の原理の応用例を示すものであり、当業者にあっては本
発明の精神および範囲を逸脱することなく他の装置を考案し得ることを理解され
たい。
日−01
F)G、 2
日G、6
St−11・もの擁す戸匪聾繁1−/JQ−ジFIG、 3
FIG、 4
FIG、 5
国際調査報告
1M1m@fil−^−wk+l+s*11s、 PCT/US as7o12
79
Claims (4)
- 1.中央計算機と、中央計算機メイン・メモリと、中央計算機大容量メモリと、 複数個の周辺データベース・メモリを有する分散データベース・システムにわい て、中央計算機大容量メモリ中に各々の周辺データベースメモリの内容のバツク アツプ・コピーを生成する方法であつて、該方法は: 周辺メモリの各々に対し1回またはそれ以上第1の更新パスを逐次実行し、該第 1のパスは、該第1のパスの実行期間中の所定の時刻にバツクアツプがそのとき とられている周辺メモリに対し更新変更を許容する状態を形成し、 所定の時刻にそのときバツクアツプがとられている周辺メモリのすべての変更個 所を中央計算機に、次いで大容量メモリに逐次送信することを含み、周辺メモリ の各々に対し第2の更新パスを逐次実行し、該第2のパスは、 所定の時刻に更新されつつある周辺メモリに対する更新変更が許容されていない 状態を形成し、最後の第1のパスの実行後に現在パツクアツプがとられている周 辺メモリに対して成されたすべての付加的変更に中央計算機に、次いで大容量メ モリに逐次送信することを含むことを特徴とする方法。
- 2.第1項記載の方法において、周辺メモリの各々は予め定められたページに分 割されており、該方法は更に:前記周辺メモリ中に含まれ、該周辺メモリ中のペ ージに相応するビツト・マツプ中のビツトを予め定められた状態にセツトして該 ページの変更を示すことを含むことを特徴とする方法。
- 3.第2項記載の方法において、第1および第2のパスの期間中の変更状態を送 信するステツプは更に:第1の予め定められた状態にセツトされた次のビツトを 見出すべくビツト・マツプを逐次走査し、見出された次のビツトを第2の予め定 められた状態にセツトし、 該ビツトにより指定された周辺メモリのページの内容を中央計算機に送信するこ とを含むことを特徴とする方法。
- 4.第3項記載の方法において、ビツト・マツプを逐次走査するステツプは更に : 第1の予め定められた状態にセツトされた以前のビツトの位置を見出した後、そ の次のビツト・アドレスにおいてビツト・マツプの逐次走査を再開し、相応する ページを中央計算機に送信することを含むことを特徴とする方法。
Applications Claiming Priority (2)
Application Number | Priority Date | Filing Date | Title |
---|---|---|---|
US634.460 | 1984-07-26 | ||
US06/634,460 US4686620A (en) | 1984-07-26 | 1984-07-26 | Database backup method |
Publications (2)
Publication Number | Publication Date |
---|---|
JPS61502846A true JPS61502846A (ja) | 1986-12-04 |
JPH061447B2 JPH061447B2 (ja) | 1994-01-05 |
Family
ID=24543879
Family Applications (1)
Application Number | Title | Priority Date | Filing Date |
---|---|---|---|
JP60503226A Expired - Lifetime JPH061447B2 (ja) | 1984-07-26 | 1985-07-03 | デ−タベ−スのバックアップの方法 |
Country Status (7)
Country | Link |
---|---|
US (1) | US4686620A (ja) |
EP (1) | EP0191036B1 (ja) |
JP (1) | JPH061447B2 (ja) |
KR (1) | KR930008684B1 (ja) |
CA (1) | CA1237201A (ja) |
DE (1) | DE3577935D1 (ja) |
WO (1) | WO1986001018A1 (ja) |
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US3588839A (en) * | 1969-01-15 | 1971-06-28 | Ibm | Hierarchical memory updating system |
JPS5633915B1 (ja) * | 1970-11-06 | 1981-08-06 | ||
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US4394733A (en) * | 1980-11-14 | 1983-07-19 | Sperry Corporation | Cache/disk subsystem |
-
1984
- 1984-07-26 US US06/634,460 patent/US4686620A/en not_active Expired - Lifetime
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1985
- 1985-07-03 JP JP60503226A patent/JPH061447B2/ja not_active Expired - Lifetime
- 1985-07-03 DE DE8585903605T patent/DE3577935D1/de not_active Expired - Fee Related
- 1985-07-03 KR KR1019860700170A patent/KR930008684B1/ko not_active IP Right Cessation
- 1985-07-03 WO PCT/US1985/001279 patent/WO1986001018A1/en active IP Right Grant
- 1985-07-03 EP EP85903605A patent/EP0191036B1/en not_active Expired - Lifetime
- 1985-07-25 CA CA000487514A patent/CA1237201A/en not_active Expired
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JPH061447B2 (ja) | 1994-01-05 |
DE3577935D1 (de) | 1990-06-28 |
WO1986001018A1 (en) | 1986-02-13 |
EP0191036A1 (en) | 1986-08-20 |
EP0191036B1 (en) | 1990-05-23 |
CA1237201A (en) | 1988-05-24 |
KR930008684B1 (ko) | 1993-09-11 |
US4686620A (en) | 1987-08-11 |
KR860700301A (ko) | 1986-08-01 |
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