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b If TS(Ti ) W-timestamp(Q), then the read operation is executed, and Rtimestamp(Q) is set to the maximum of R-timestamp(Q) and TS(Ti ) 2 Suppose that transaction Ti issues write(Q) a If TS(Ti ) < R-timestamp(Q), then the value of Q that Ti is producing was needed previously, and the system assumed that that value would never be produced Hence, the system rejects the write operation and rolls Ti back b If TS(Ti ) < W-timestamp(Q), then Ti is attempting to write an obsolete value of Q Hence, the system rejects this write operation and rolls Ti back c Otherwise, the system executes the write operation and sets W-timestamp(Q) to TS(Ti ) If a transaction Ti is rolled back by the concurrency-control scheme as result of issuance of either a read or write operation, the system assigns it a new timestamp and restarts it To illustrate this protocol, we consider transactions T14 and T15 Transaction T14 displays the contents of accounts A and B: T14 : read(B); read(A); display(A + B) Transaction T15 transfers $50 from account A to account B, and then displays the contents of both: T15 : read(B); B := B 50; write(B); read(A); A := A + 50; write(A); display(A + B) In presenting schedules under the timestamp protocol, we shall assume that a transaction is assigned a timestamp immediately before its rst instruction Thus, in schedule 3 of Figure 1613, TS(T14 ) < TS(T15 ), and the schedule is possible under the timestamp protocol We note that the preceding execution can also be produced by the two-phase locking protocol There are, however, schedules that are possible under the two-phase locking protocol, but are not possible under the timestamp protocol, and vice versa (see Exercise 1620) The timestamp-ordering protocol ensures con ict serializability This is because con icting operations are processed in timestamp order The protocol ensures freedom from deadlock, since no transaction ever waits However, there is a possibility of starvation of long transactions if a sequence of con icting short transactions causes repeated restarting of the long transaction If.

The McGraw Hill Companies, 2001

16

Remember, a resistor is an element that gives off energy, usually in the form of heat and sometimes in the form of light Hence, a resistor always absorbs power

T14 read (B)

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T15 read (B) B := B 50 write(B)

a transaction is found to be getting restarted repeatedly, con icting transactions need to be temporarily blocked to enable the transaction to nish The protocol can generate schedules that are not recoverable However, it can be extended to make the schedules recoverable, in one of several ways: Recoverability and cascadelessness can be ensured by performing all writes together at the end of the transaction The writes must be atomic in the following sense: While the writes are in progress, no transaction is permitted to access any of the data items that have been written Recoverability and cascadelessness can also be guaranteed by using a limited form of locking, whereby reads of uncommitted items are postponed until the transaction that updated the item commits (see Exercise 1622) Recoverability alone can be ensured by tracking uncommitted writes, and allowing a transaction Ti to commit only after the commit of any transaction that wrote a value that Ti read Commit dependencies, outlined in Section 1615, can be used for this purpose

When doing circuit analysis with a network that contains resistors, we apply KCL and KVL using Ohm s law to relate the voltage to the current as necessary The best way to proceed is to look at some examples EXAMPLE 2-5 Find the three unknown currents shown in Fig 2-8 SOLUTION We will denote the voltage across each resistor R by VR First we apply KVL to each of the two panes or loops in the circuit Going in a clockwise direction, the loop on the left-hand side of Fig 2-8 gives 7 + V5 = 0 where V5 is the voltage across the 5 resistor in the center We conclude from KVL that V5 = 7 V Using Ohm s law (26) we can nd the current through the