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Lecture 10: Transactions

Lecture 10: Transactions. The Setting. Database systems are normally being accessed by many users or processes at the same time. Both queries and modifications. Unlike operating systems, which support interaction of processes, a DMBS needs to keep processes from troublesome interactions.

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Lecture 10: Transactions

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  1. Lecture 10: Transactions

  2. The Setting • Database systems are normally being accessed by many users or processes at the same time. • Both queries and modifications. • Unlike operating systems, which support interaction of processes, a DMBS needs to keep processes from troublesome interactions.

  3. Example: Bad Interaction • You and your domestic partner each take $100 from different ATM’s at about the same time. • The DBMS better make sure one account deduction doesn’t get lost. • Compare: An OS allows two people to edit a document at the same time. If both write, one’s changes get lost.

  4. ACID Transactions • A DBMS is expected to support “ACID transactions,” processes that are: • Atomic : Either the whole process is done or none is. • Consistent : Database constraints are preserved. • Isolated : It appears to the user as if only one process executes at a time. • Durable: Effects of a process do not get lost if the system crashes.

  5. Transactions in SQL • SQL supports transactions, often behind the scenes. • Each statement issued at the generic query interface is a transaction by itself. • In programming interfaces like Embedded SQL or PSM, a transaction begins the first time a SQL statement is executed and ends with the program or an explicit transaction-end.

  6. COMMIT • The SQL statement COMMIT causes a transaction to complete. • It’s database modifications are now permanent in the database.

  7. ROLLBACK • The SQL statement ROLLBACK also causes the transaction to end, but by aborting. • No effects on the database. • Failures like division by 0 or a constraint violation can also cause rollback, even if the programmer does not request it.

  8. An Example: Interacting Processes • Assume the usual Sells(bar,beer,price) relation, and suppose that Joe’s Bar sells only Bud for $2.50 and Miller for $3.00. • Sally is querying Sells for the highest and lowest price Joe charges. • Joe decides to stop selling Bud and Miller, but to sell only Heineken at $3.50.

  9. Sally’s Program • Sally executes the following two SQL statements, which we call (min) and (max), to help remember what they do. (max) SELECT MAX(price) FROM Sells WHERE bar = ’Joe’’s Bar’; (min) SELECT MIN(price) FROM Sells WHERE bar = ’Joe’’s Bar’;

  10. Joe’s Program • At about the same time, Joe executes the following steps, which have the mnemonic names (del) and (ins). (del) DELETE FROM Sells WHERE bar = ’Joe’’s Bar’; (ins) INSERT INTO Sells VALUES(’Joe’’s Bar’, ’Heineken’, 3.50);

  11. Interleaving of Statements • Although (max) must come before (min), and (del) must come before (ins), there are no other constraints on the order of these statements, unless we group Sally’s and/or Joe’s statements into transactions.

  12. 2.50, 3.00 2.50, 3.00 3.50 (max) (del) (min) 3.00 3.50 Example: Strange Interleaving • Suppose the steps execute in the order (max)(del)(ins)(min). Joe’s Prices: Statement: Result: • Sally sees MAX < MIN! (ins)

  13. Fixing the Problem by Using Transactions • If we group Sally’s statements (max)(min) into one transaction, then she cannot see this inconsistency. • She sees Joe’s prices at some fixed time. • Either before or after he changes prices, or in the middle, but the MAX and MIN are computed from the same prices.

  14. Another Problem: Rollback • Suppose Joe executes (del)(ins), not as a transaction, but after executing these statements, thinks better of it and issues a ROLLBACK statement. • If Sally executes her statements after (ins) but before the rollback, she sees a value, 3.50, that never existed in the database.

  15. Solution • If Joe executes (del)(ins) as a transaction, its effect cannot be seen by others until the transaction executes COMMIT. • If the transaction executes ROLLBACK instead, then its effects can never be seen.

  16. Isolation Levels • SQL defines four isolation levels = choices about what interactions are allowed by transactions that execute at about the same time. • How a DBMS implements these isolation levels is highly complex, and a typical DBMS provides its own options.

  17. Choosing the Isolation Level • Within a transaction, we can say: SET TRANSACTION ISOLATION LEVEL X where X = • SERIALIZABLE • REPEATABLE READ • READ COMMITTED • READ UNCOMMITTED

  18. Serializable Transactions • If Sally = (max)(min) and Joe = (del)(ins) are each transactions, and Sally runs with isolation level SERIALIZABLE, then she will see the database either before or after Joe runs, but not in the middle. • It’s up to the DBMS vendor to figure out how to do that, e.g.: • True isolation in time. • Keep Joe’s old prices around to answer Sally’s queries.

  19. Isolation Level Is Personal Choice • Your choice, e.g., run serializable, affects only how you see the database, not how others see it. • Example: If Joe Runs serializable, but Sally doesn’t, then Sally might see no prices for Joe’s Bar. • i.e., it looks to Sally as if she ran in the middle of Joe’s transaction.

  20. Read-Commited Transactions • If Sally runs with isolation level READ COMMITTED, then she can see only committed data, but not necessarily the same data each time. • Example: Under READ COMMITTED, the interleaving (max)(del)(ins)(min) is allowed, as long as Joe commits. • Sally sees MAX < MIN.

  21. Repeatable-Read Transactions • Requirement is like read-committed, plus: if data is read again, then everything seen the first time will be seen the second time. • But the second and subsequent reads may see more tuples as well.

  22. Example: Repeatable Read • Suppose Sally runs under REPEATABLE READ, and the order of execution is (max)(del)(ins)(min). • (max) sees prices 2.50 and 3.00. • (min) can see 3.50, but must also see 2.50 and 3.00, because they were seen on the earlier read by (max).

  23. Read Uncommitted • A transaction running under READ UNCOMMITTED can see data in the database, even if it was written by a transaction that has not committed (and may never). • Example: If Sally runs under READ UNCOMMITTED, she could see a price 3.50 even if Joe later aborts.

  24. Concurrency Control T1 T2 … Tn DB (consistency constraints)

  25. Review • Why do we need transaction? • What’s ACID? • What’s SQL support for transaction? • What’s the four isolation level • SERIALIZABLE • REPEATABLE READ • READ COMMITTED • READ UNCOMMITTED

  26. Example: T1: Read(A) T2: Read(A) A  A+100 A  A2 Write(A) Write(A) Read(B) Read(B) B  B+100 B  B2 Write(B) Write(B) Constraint: A=B

  27. A B 25 25 125 125 250 250 250 250 Schedule A T1 T2 Read(A); A  A+100 Write(A); Read(B); B  B+100; Write(B); Read(A);A  A2; Write(A); Read(B);B  B2; Write(B);

  28. A B 25 25 50 50 150 150 150 150 Schedule B T1 T2 Read(A);A  A2; Write(A); Read(B);B  B2; Write(B); Read(A); A  A+100 Write(A); Read(B); B  B+100; Write(B);

  29. A B 25 25 125 250 125 250 250 250 Schedule C T1 T2 Read(A); A  A+100 Write(A); Read(A);A  A2; Write(A); Read(B); B  B+100; Write(B); Read(B);B  B2; Write(B);

  30. A B 25 25 125 250 50 150 250 150 Schedule D T1 T2 Read(A); A  A+100 Write(A); Read(A);A  A2; Write(A); Read(B);B  B2; Write(B); Read(B); B  B+100; Write(B);

  31. A B 25 25 125 125 25 125 125 125 Same as Schedule D but with new T2’ Schedule E T1 T2’ Read(A); A  A+100 Write(A); Read(A);A  A1; Write(A); Read(B);B  B1; Write(B); Read(B); B  B+100; Write(B);

  32. Want schedules that are “good”, regardless of • initial state and • transaction semantics • Only look at order of read and writes Example: Sc=r1(A)w1(A)r2(A)w2(A)r1(B)w1(B)r2(B)w2(B)

  33. Example: Sc=r1(A)w1(A)r2(A)w2(A)r1(B)w1(B)r2(B)w2(B) Sc’=r1(A)w1(A) r1(B)w1(B)r2(A)w2(A)r2(B)w2(B) T1 T2

  34. Review • Why do we need transaction? • What’s ACID? • What’s SQL support for transaction? • What’s the four isolation level • SERIALIZABLE • REPEATABLE READ • READ COMMITTED • READ UNCOMMITTED

  35. Example: T1: Read(A) T2: Read(A) A  A+100 A  A2 Write(A) Write(A) Read(B) Read(B) B  B+100 B  B2 Write(B) Write(B) Constraint: A=B

  36. A B 25 25 125 250 50 150 250 150 Schedule D T1 T2 Read(A); A  A+100 Write(A); Read(A);A  A2; Write(A); Read(B);B  B2; Write(B); Read(B); B  B+100; Write(B);

  37. However, for Sd: Sd=r1(A)w1(A)r2(A)w2(A) r2(B)w2(B)r1(B)w1(B) • as a matter of fact, T2 must precede T1 in any equivalent schedule, i.e., T2 T1

  38. T2 T1 • Also, T1 T2 T1 T2 Sd cannot be rearranged into a serial schedule Sd is not “equivalent” to any serial schedule Sd is “bad”

  39. A B 25 25 125 250 125 250 250 250 Schedule C T1 T2 Read(A); A  A+100 Write(A); Read(A);A  A2; Write(A); Read(B); B  B+100; Write(B); Read(B);B  B2; Write(B);

  40. Returning to Sc Sc=r1(A)w1(A)r2(A)w2(A)r1(B)w1(B)r2(B)w2(B) T1 T2 T1 T2  no cycles  Sc is “equivalent” to a serial schedule (in this case T1,T2)

  41. Concepts Transaction: sequence of ri(x), wi(x) actions Conflicting actions: r1(A) w2(A) w1(A) w2(A) r1(A) w2(A) Schedule: represents chronological order in which actions are executed Serial schedule: no interleaving of actions or transactions

  42. Definition S1, S2 are conflict equivalentschedules if S1 can be transformed into S2 by a series of swaps on non-conflicting actions.

  43. Definition A schedule is conflict serializable if it is conflict equivalent to some serial schedule.

  44. Precedence graph P(S) (S is schedule) Nodes: transactions in S Arcs: Ti  Tj whenever - pi(A), qj(A) are actions in S - pi(A) <S qj(A) - at least one of pi, qj is a write

  45. Exercise: • What is P(S) forS = w3(A) w2(C) r1(A) w1(B) r1(C) w2(A) r4(A) w4(D) • Is S serializable?

  46. Another Exercise: • What is P(S) forS = w1(A) r2(A) r3(A) w4(A) ?

  47. Proof: Assume P(S1)  P(S2)  Ti: Ti  Tj in S1 and not in S2  S1 = …pi(A)... qj(A)… pi, qj S2 = …qj(A)…pi(A)... conflict  S1, S2 not conflict equivalent Lemma S1, S2 conflict equivalent  P(S1)=P(S2)

  48. Counter example: S1=w1(A) r2(A) w2(B) r1(B) S2=r2(A) w1(A) r1(B) w2(B) Note: P(S1)=P(S2)  S1, S2 conflict equivalent

  49. Theorem P(S1) acyclic  S1 conflict serializable () Assume S1 is conflict serializable  Ss: Ss, S1 conflict equivalent  P(Ss)=P(S1)  P(S1) acyclic since P(Ss) is acyclic

  50. Theorem P(S1) acyclic  S1 conflict serializable T1 T2 T3 T4 () Assume P(S1) is acyclic Transform S1 as follows: (1) Take T1 to be transaction with no incident arcs (2) Move all T1 actions to the front S1 = ……. qj(A)…….p1(A)….. (3) we now have S1 = < T1 actions ><... rest ...> (4) repeat above steps to serialize rest!

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