?Silberschatz,Korth and Sudarshan16.1Database System Concepts 3rd Edition
Chapter 16,Concurrency Control
? Lock-Based Protocols（ 基于锁的协议）
? Timestamp-Based Protocols（ 基于时间戳的协议）
? Validation-Based Protocols（ 基于有效性检查的协议）
? Multiple Granularity（ 多粒度）
? Multiversion Schemes（ 多版本机制）
? Deadlock Handling（ 死锁处理）
? Insert and Delete Operations（ 插入与删除处理）
?Silberschatz,Korth and Sudarshan16.2Database System Concepts 3rd Edition
Lock-Based Protocols（ 基于锁的协议）
? A lock is a mechanism to control concurrent access to a
data item
? Data items can be locked in two modes,
1,exclusive排他锁 (X) mode,Data item can be both read
as well as written,X-lock is requested using lock-X
instruction.
2,shared共享锁 (S) mode,Data item can only be read,S-
lock is requested using lock-S instruction.
? Lock requests are made to concurrency-control manager,
Transaction can proceed only after request is granted.
?Silberschatz,Korth and Sudarshan16.3Database System Concepts 3rd Edition
Lock-Based Protocols (Cont.)
? Lock-compatibility matrix（ 锁相容性矩阵）
? A transaction may be granted a lock on an item if the
requested lock is compatible with locks already held on the
item by other transactions
? Any number of transactions can hold shared locks on an
item,but if any transaction holds an exclusive on the item
no other transaction may hold any lock on the item.
? If a lock cannot be granted,the requesting transaction is
made to wait till all incompatible locks held by other
transactions have been released,The lock is then granted.
?Silberschatz,Korth and Sudarshan16.4Database System Concepts 3rd Edition
Lock-Based Protocols (Cont.)
? Example of a transaction performing locking:
T1,lock-X(B) T2,lock-S(A)
read (B) read (A)
B:=B-50 unlock(A)
write(B) lock-S(B)
unlock(B) read (B)
lock-X(A) unlock(B);
read(A) display(A+B)
A:=A+50
write(A)
unlock(B)
?Silberschatz,Korth and Sudarshan16.5Database System Concepts 3rd Edition
Lock-Based Protocols (Cont.)
T1 T2 concurrency-control manager
lock-X(B) grant-X(B,T1)
read (B)
B:=B-50
write(B)
unlock(B)
lock-S(A) grant-S(A,T2)
read (A)
unlock(A)
lock-S(B) grant-S(B,T2)
read (B)
unlock(B)
display(A+B)
lock-X(A) grant-X(A,T1)
read(A)
A:=A+50
write(A)
unlock(B)
?Silberschatz,Korth and Sudarshan16.6Database System Concepts 3rd Edition
Pitfalls of Lock-Based Protocols
? Consider the partial schedule
Such a situation is called a deadlock（ 死锁）,
?To handle a deadlock one of T3 or T4 must be rolledback
and its locks released.
?Silberschatz,Korth and Sudarshan16.7Database System Concepts 3rd Edition
Pitfalls of Lock-Based Protocols (Cont.)
? The potential for deadlock exists in most locking protocols,
Deadlocks are a necessary evil.
? Starvation（ 饿死） is also possible if concurrency control
manager is badly designed,For example:
T5 T6 T7 T8
lock-S(Q)
Lock-X(Q)
lock-S(Q)
unlock(Q)
lock-S(Q)
unlock(Q)
unlock(Q)
?Silberschatz,Korth and Sudarshan16.8Database System Concepts 3rd Edition
The Two-Phase Locking Protocol
（ 两段锁协议）
? This is a protocol which ensures conflict-serializable
schedules.
? Phase 1,Growing Phase（ 增长阶段）
?transaction may obtain locks
?transaction may not release locks
? Phase 2,Shrinking Phase（ 缩减阶段）
?transaction may release locks
?transaction may not obtain locks
? The protocol assures serializability,It can be proved that the
transactions can be serialized in the order of their lock
points 封锁点 (i.e,the point where a transaction acquired its
final lock),
?Silberschatz,Korth and Sudarshan16.9Database System Concepts 3rd Edition
The Two-Phase Locking Protocol (Cont.)
? Two-phase locking does not ensure freedom from
deadlocks
? Cascading roll-back is possible under two-phase locking,
To avoid this,follow a modified protocol called strict two-
phase locking（ 严格两段锁）, Here a transaction must
hold all its exclusive locks till it commits/aborts.
? Rigorous two-phase locking（ 强两段锁） is even
stricter,here all locks are held till commit/abort,In this
protocol transactions can be serialized in the order in which
they commit.
?Silberschatz,Korth and Sudarshan16.10Database System Concepts 3rd Edition
The Two-Phase Locking Protocol (Cont.)
?Silberschatz,Korth and Sudarshan16.11Database System Concepts 3rd Edition
Lock Conversions（ 锁的转换）
? Two-phase locking with lock conversions:
– First Phase,
?can acquire a lock-S on item
?can acquire a lock-X on item
?can convert a lock-S to a lock-X (upgrade)
– Second Phase:
?can release a lock-S
?can release a lock-X
?can convert a lock-X to a lock-S (downgrade)
? This protocol assures serializability,But still relies on the
programmer to insert the various locking instructions.
?Silberschatz,Korth and Sudarshan16.12Database System Concepts 3rd Edition
Lock Conversions（ 锁的转换）
?Silberschatz,Korth and Sudarshan16.13Database System Concepts 3rd Edition
Graph-Based Protocols（基于图的协议）
? Graph-based protocols are an alternative to two-
phase locking
? Impose a partial ordering ? on the set D = {d1,d2,...,
dh} of all data items.
?If di ? dj then any transaction accessing both di
and dj must access di before accessing dj.
?Implies that the set D may now be viewed as a
directed acyclic graph,called a database graph.
? The tree-protocol is a simple kind of graph protocol,
?Silberschatz,Korth and Sudarshan16.14Database System Concepts 3rd Edition
Tree Protocol（树形协议）
The first lock by Ti may be on any data item,
? Subsequently,a data Q can be locked by Ti only if the parent of
Q is currently locked by Ti.
? Data items may be unlocked at any time.
? A data item that has been locked and unlocked by Ti cannot
subsequently be relocked by Ti
加锁指令只有 lock-X
事务 T的首次加锁可以对任何
数据项进行 此后，事务 T对数据项 Q加锁的前提是事
务 T持有 Q的双亲数据项上的锁
对数据项解锁可以随时进行
数据项被事务 T加锁并解锁之后
，就不能再对该数据项加锁
?Silberschatz,Korth and Sudarshan16.15Database System Concepts 3rd Edition
Tree Protocol
?Silberschatz,Korth and Sudarshan16.16Database System Concepts 3rd Edition
Tree Protocol(Cont.)
? Unlocking may occur earlier in the tree-locking
protocol than in the two-phase locking protocol.
?shorter waiting times,and increase in concurrency
?protocol is deadlock-free,no rollbacks are required
? However,in the tree-locking protocol,a transaction
may have to lock data items that it does not access.
?increased locking overhead,and additional waiting
time
?potential decrease in concurrency
?Silberschatz,Korth and Sudarshan16.17Database System Concepts 3rd Edition
Timestamp-Based Protocols (基于时间戳的协议 )
? Each transaction is issued a timestamp when it enters the
system,If an old transaction Ti has time-stamp TS(Ti),a new
transaction Tj is assigned time-stamp TS(Tj) such that TS(Ti)
<TS(Tj),
? The protocol manages concurrent execution such that the
time-stamps determine the serializability order.
? In order to assure such behavior,the protocol maintains for
each data Q two timestamp values:
?W-timestamp(Q) is the largest time-stamp of any
transaction that executed write(Q) successfully.
?R-timestamp(Q) is the largest time-stamp of any
transaction that executed read(Q) successfully.
?Silberschatz,Korth and Sudarshan16.18Database System Concepts 3rd Edition
Timestamp-Based Protocols (Cont.)
? The timestamp ordering protocol ensures that any
conflicting read and write operations are executed in
timestamp order.
? Suppose a transaction Ti issues a read(Q)
1,If TS(Ti) ? W-timestamp(Q),then Ti needs to read a value
of Q that was already overwritten,Hence,the read
operation is rejected,and Ti is rolled back.
2,If TS(Ti)? W-timestamp(Q),then the read operation is
executed,and R-timestamp(Q) is set to the maximum of
R-timestamp(Q) and TS(Ti).
?Silberschatz,Korth and Sudarshan16.19Database System Concepts 3rd Edition
Timestamp-Based Protocols (Cont.)
? Suppose that transaction Ti issues write(Q).
? 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 write
operation is rejected,and Ti is rolled back.
? If TS(Ti) < W-timestamp(Q),then Ti is attempting to write an
obsolete value of Q,Hence,this write operation is rejected,
and Ti is rolled back.
? Otherwise,the write operation is executed,and W-
timestamp(Q) is set to TS(Ti).
?Silberschatz,Korth and Sudarshan16.20Database System Concepts 3rd Edition
Example Use of the Protocol
?Silberschatz,Korth and Sudarshan16.21Database System Concepts 3rd Edition
Example Use of the Protocol
A partial schedule for several data items for transactions with
timestamps 1,2,3,4,5
T1 T2 T3 T4 T5
read(Y) read(X) read(Y)
write(Y)
write(Z)
read(Z)
read(X)
read(X) write(Z)
write(Y)
write(Z)
?Silberschatz,Korth and Sudarshan16.22Database System Concepts 3rd Edition
Thomas’ Write Rule（托马斯写规则）
? When Ti attempts to write data item Q,if TS(Ti) < W-
timestamp(Q),then Ti is attempting to write an obsolete
value of {Q},Hence,rather than rolling back Ti as the
timestamp ordering protocol would have done,this {write}
operation can be ignored.
? Otherwise this protocol is the same as the timestamp
ordering protocol.
? Thomas' Write Rule allows greater potential concurrency,
?Silberschatz,Korth and Sudarshan16.23Database System Concepts 3rd Edition
Validation-Based Protocol
（ 基于有效性检查的协议）
? Execution of transaction Ti is done in three phases.
1,Read phase,Transaction Ti writes only to temporary local
variables
2,Validation phase,Transaction Ti performs a ``validation
test'' to determine if local variables can be written without
violating serializability.
3,Write phase,If Ti is validated,the updates are applied to
the database; otherwise,Ti is rolled back.
? Also called as optimistic concurrency control since
transaction executes fully in the hope that all will go well
during validation
?Silberschatz,Korth and Sudarshan16.24Database System Concepts 3rd Edition
Validation-Based Protocol (Cont.)
? Each transaction Ti has 3 timestamps
? Start(Ti), the time when Ti started its execution
? Validation(Ti),the time when Ti entered its validation phase
? Finish(Ti), the time when Ti finished its write phase
? Serializability order is determined by timestamp given at
validation time,to increase concurrency,Thus TS(Ti) is
given the value of Validation(Ti).
?Silberschatz,Korth and Sudarshan16.25Database System Concepts 3rd Edition
Schedule Produced by Validation
? Example of schedule produced using validation
T14 T15
read(B) read(B)
B:- B-50
read(A)
A:- A+50read(A)
(validate)
display (A+B) (validate)
write (B)
write (A)
?Silberschatz,Korth and Sudarshan16.26Database System Concepts 3rd Edition
Multiple Granularity （ 多粒度）
? Allow data items to be of various sizes and define a
hierarchy of data granularities,where the small
granularities are nested within larger ones
? Can be represented graphically as a tree (but don't
confuse with tree-locking protocol)
? When a transaction locks a node in the tree explicitly,it
implicitly locks all the node's descendents in the same
mode.
? Granularity of locking (level in tree where locking is done):
?fine granularity (lower in tree),high concurrency,high
locking overhead
?coarse granularity (higher in tree),low locking
overhead,low concurrency
?Silberschatz,Korth and Sudarshan16.27Database System Concepts 3rd Edition
Example of Granularity Hierarchy
The highest level in the example hierarchy is the entire
database.
The levels below are of type area,file and record in that order.
?Silberschatz,Korth and Sudarshan16.28Database System Concepts 3rd Edition
Multiversion Schemes （ 多版本机制）
? Multiversion schemes keep old versions of data item to
increase concurrency.
?Multiversion Timestamp Ordering
?Multiversion Two-Phase Locking
? Each successful write results in the creation of a new
version of the data item written.
? Use timestamps to label versions.
? When a read(Q) operation is issued,select an appropriate
version of Q based on the timestamp of the transaction,
and return the value of the selected version,
? reads never have to wait as an appropriate version is
returned immediately.
?Silberschatz,Korth and Sudarshan16.29Database System Concepts 3rd Edition
Deadlock Handling （ 死锁处理）
? Consider the following two transactions:
T1,write (X) T2,write(Y)
write(Y) write(X)
? Schedule with deadlock
T1 T2
lock-X on X
write (X) lock-X on Y
write (X)
wait for lock-X on Xwait for lock-X on Y
?Silberschatz,Korth and Sudarshan16.30Database System Concepts 3rd Edition
Deadlock Handling
? System is deadlocked if there is a set of transactions such
that every transaction in the set is waiting for another
transaction in the set.
? Deadlock prevention（ 死锁预防） protocols ensure that
the system will never enter into a deadlock state,
?Silberschatz,Korth and Sudarshan16.31Database System Concepts 3rd Edition
More Deadlock Prevention Strategies
? Following schemes use transaction timestamps for the sake
of deadlock prevention alone.
? wait-die（ 等待－死亡） scheme — non-preemptive
?older transaction may wait for younger one to release
data item,Younger transactions never wait for older ones;
they are rolled back instead.
?a transaction may die several times before acquiring
needed data item
? wound-wait（ 受伤－死亡） scheme — preemptive
?older transaction wounds (forces rollback) of younger
transaction instead of waiting for it,Younger transactions
may wait for older ones.
?may be fewer rollbacks than wait-die scheme.
?Silberschatz,Korth and Sudarshan16.32Database System Concepts 3rd Edition
Deadlock prevention (Cont.)
? Both in wait-die and in wound-wait schemes,a rolled back
transactions is restarted with its original timestamp,Older
transactions thus have precedence over newer ones,and
starvation is hence avoided.
? Timeout-Based Schemes,
?a transaction waits for a lock only for a specified amount
of time,After that,the wait times out and the transaction
is rolled back.
?thus deadlocks are not possible
?simple to implement; but starvation is possible,Also
difficult to determine good value of the timeout interval.
?Silberschatz,Korth and Sudarshan16.33Database System Concepts 3rd Edition
Deadlock Detection
? Deadlocks can be described as a wait-for graph,which
consists of a pair G = (V,E),
?V is a set of vertices (all the transactions in the system)
?E is a set of edges; each element is an ordered pair Ti
?Tj,
? If Ti ? Tj is in E,then there is a directed edge from Ti to Tj,
implying that Ti is waiting for Tj to release a data item.
? When Ti requests a data item currently being held by Tj,
then the edge Ti Tj is inserted in the wait-for graph,This
edge is removed only when Tj is no longer holding a data
item needed by Ti.
? The system is in a deadlock state if and only if the wait-for
graph has a cycle,Must invoke a deadlock-detection
algorithm periodically to look for cycles.
?Silberschatz,Korth and Sudarshan16.34Database System Concepts 3rd Edition
Deadlock Detection (Cont.)
Wait-for graph without a cycle Wait-for graph with a cycle
?Silberschatz,Korth and Sudarshan16.35Database System Concepts 3rd Edition
Deadlock Recovery
? When deadlock is detected,
?Some transaction will have to rolled back (made a victim)
to break deadlock,Select that transaction as victim that
will incur minimum cost.
?Rollback -- determine how far to roll back transaction
?Total rollback,Abort the transaction and then restart it.
?More effective to roll back transaction only as far as
necessary to break deadlock.
?Starvation happens if same transaction is always chosen
as victim,Include the number of rollbacks in the cost
factor to avoid starvation
?Silberschatz,Korth and Sudarshan16.36Database System Concepts 3rd Edition
Insert and Delete Operations
? If two-phase locking is used,
?A delete operation may be performed only if the
transaction deleting the tuple has an exclusive lock on
the tuple to be deleted.
?A transaction that inserts a new tuple into the database
is given an X-mode lock on the tuple
?Silberschatz,Korth and Sudarshan16.37Database System Concepts 3rd Edition
Insert and Delete Operations (Cont.)
? The transaction scanning the relation is reading information that
indicates what tuples the relation contains,while a transaction
inserting a tuple updates the same information.
? The information should be locked.
? One solution,
? Associate a data item with the relation,to represent the information
about what tuples the relation contains.
? Transactions scanning the relation acquire a shared lock in the data
item,
? Transactions inserting or deleting a tuple acquire an exclusive lock on
the data item,(Note,locks on the data item do not conflict with locks on
individual tuples.)
? Above protocol provides very low concurrency for
insertions/deletions.
? Index locking protocols provide higher concurrency while
preventing the phantom phenomenon,by requiring locks
on certain index buckets,
?Silberschatz,Korth and Sudarshan16.38Database System Concepts 3rd Edition
Index Locking Protocol
? Every relation must have at least one index,Access to a relation must
be made only through one of the indices on the relation.
? A transaction Ti that performs a lookup must lock all the index buckets
that it accesses,in S-mode.
? A transaction Ti may not insert a tuple ti into a relation r without
updating all indices to r.
? Ti must perform a lookup on every index to find all index buckets that
could have possibly contained a pointer to tuple ti,had it existed
already,and obtain locks in X-mode on all these index buckets,Ti must
also obtain locks in X-mode on all index buckets that it modifies.
? The rules of the two-phase locking protocol must be observed.
?Silberschatz,Korth and Sudarshan16.39Database System Concepts 3rd Edition
Weak Levels of Consistency
? Degree-two consistency,differs from two-phase locking in that
S-locks may be released at any time,and locks may be acquired
at any time
? X-locks must be held till end of transaction
? Serializability is not guaranteed,programmer must ensure that no
erroneous database state will occur]
? Cursor stability,
? For reads,each tuple is locked,read,and lock is immediately
released
? X-locks are held till end of transaction
? Special case of degree-two consistency
?Silberschatz,Korth and Sudarshan16.40Database System Concepts 3rd Edition
Weak Levels of Consistency in SQL
? SQL allows non-serializable executions
? Serializable,is the default
? Repeatable read,allows only committed records to be read,and
repeating a read should return the same value (so read locks should
be retained)
? However,the phantom phenomenon need not be prevented
– T1 may see some records inserted by T2,but may not see
others inserted by T2
? Read committed,same as degree two consistency,but most
systems implement it as cursor-stability
? Read uncommitted,allows even uncommitted data to be read
?Silberschatz,Korth and Sudarshan16.41Database System Concepts 3rd Edition
Concurrency in Index Structures
? Indices are unlike other database items in that their only job is to
help in accessing data.
? Index-structures are typically accessed very often,much more
than other database items,
? Treating index-structures like other database items leads to low
concurrency,Two-phase locking on an index may result in
transactions executing practically one-at-a-time.
? It is acceptable to have nonserializable concurrent access to an
index as long as the accuracy of the index is maintained.
? In particular,the exact values read in an internal node of a
B+-tree are irrelevant so long as we land up in the correct leaf
node.
? There are index concurrency protocols where locks on internal
nodes are released early,and not in a two-phase fashion.
?Silberschatz,Korth and Sudarshan16.42Database System Concepts 3rd Edition
Concurrency in Index Structures (Cont.)
? Example of index concurrency protocol:
? Use crabbing instead of two-phase locking on the nodes of the
B+-tree,as follows,During search/insertion/deletion:
? First lock the root node in shared mode.
? After locking all required children of a node in shared mode,release
the lock on the node.
? During insertion/deletion,upgrade leaf node locks to exclusive
mode.
? When splitting or coalescing requires changes to a parent,lock the
parent in exclusive mode.
? Above protocol can cause excessive deadlocks,Better protocols
are available; see Section 16.9 for one such protocol,the B-link
tree protocol
End of Chapter
?Silberschatz,Korth and Sudarshan16.44Database System Concepts 3rd Edition
Tree-Structured Database Graph
?Silberschatz,Korth and Sudarshan16.45Database System Concepts 3rd Edition
Serializable Schedule Under the Tree Protocol
?Silberschatz,Korth and Sudarshan16.46Database System Concepts 3rd Edition
Schedule 5,A Schedule Produced by Using Validation
?Silberschatz,Korth and Sudarshan16.47Database System Concepts 3rd Edition
Granularity Hierarchy
?Silberschatz,Korth and Sudarshan16.48Database System Concepts 3rd Edition
Compatibility Matrix
?Silberschatz,Korth and Sudarshan16.49Database System Concepts 3rd Edition
Nonserializable Schedule with Degree-Two
Consistency
?Silberschatz,Korth and Sudarshan16.50Database System Concepts 3rd Edition
B+-Tree For account File with n = 3.
?Silberschatz,Korth and Sudarshan16.51Database System Concepts 3rd Edition
Insertion of,Clearview” Into the B+-Tree of Figure
16.21
?Silberschatz,Korth and Sudarshan16.52Database System Concepts 3rd Edition
Lock-Compatibility Matrix
Chapter 16,Concurrency Control
? Lock-Based Protocols（ 基于锁的协议）
? Timestamp-Based Protocols（ 基于时间戳的协议）
? Validation-Based Protocols（ 基于有效性检查的协议）
? Multiple Granularity（ 多粒度）
? Multiversion Schemes（ 多版本机制）
? Deadlock Handling（ 死锁处理）
? Insert and Delete Operations（ 插入与删除处理）
?Silberschatz,Korth and Sudarshan16.2Database System Concepts 3rd Edition
Lock-Based Protocols（ 基于锁的协议）
? A lock is a mechanism to control concurrent access to a
data item
? Data items can be locked in two modes,
1,exclusive排他锁 (X) mode,Data item can be both read
as well as written,X-lock is requested using lock-X
instruction.
2,shared共享锁 (S) mode,Data item can only be read,S-
lock is requested using lock-S instruction.
? Lock requests are made to concurrency-control manager,
Transaction can proceed only after request is granted.
?Silberschatz,Korth and Sudarshan16.3Database System Concepts 3rd Edition
Lock-Based Protocols (Cont.)
? Lock-compatibility matrix（ 锁相容性矩阵）
? A transaction may be granted a lock on an item if the
requested lock is compatible with locks already held on the
item by other transactions
? Any number of transactions can hold shared locks on an
item,but if any transaction holds an exclusive on the item
no other transaction may hold any lock on the item.
? If a lock cannot be granted,the requesting transaction is
made to wait till all incompatible locks held by other
transactions have been released,The lock is then granted.
?Silberschatz,Korth and Sudarshan16.4Database System Concepts 3rd Edition
Lock-Based Protocols (Cont.)
? Example of a transaction performing locking:
T1,lock-X(B) T2,lock-S(A)
read (B) read (A)
B:=B-50 unlock(A)
write(B) lock-S(B)
unlock(B) read (B)
lock-X(A) unlock(B);
read(A) display(A+B)
A:=A+50
write(A)
unlock(B)
?Silberschatz,Korth and Sudarshan16.5Database System Concepts 3rd Edition
Lock-Based Protocols (Cont.)
T1 T2 concurrency-control manager
lock-X(B) grant-X(B,T1)
read (B)
B:=B-50
write(B)
unlock(B)
lock-S(A) grant-S(A,T2)
read (A)
unlock(A)
lock-S(B) grant-S(B,T2)
read (B)
unlock(B)
display(A+B)
lock-X(A) grant-X(A,T1)
read(A)
A:=A+50
write(A)
unlock(B)
?Silberschatz,Korth and Sudarshan16.6Database System Concepts 3rd Edition
Pitfalls of Lock-Based Protocols
? Consider the partial schedule
Such a situation is called a deadlock（ 死锁）,
?To handle a deadlock one of T3 or T4 must be rolledback
and its locks released.
?Silberschatz,Korth and Sudarshan16.7Database System Concepts 3rd Edition
Pitfalls of Lock-Based Protocols (Cont.)
? The potential for deadlock exists in most locking protocols,
Deadlocks are a necessary evil.
? Starvation（ 饿死） is also possible if concurrency control
manager is badly designed,For example:
T5 T6 T7 T8
lock-S(Q)
Lock-X(Q)
lock-S(Q)
unlock(Q)
lock-S(Q)
unlock(Q)
unlock(Q)
?Silberschatz,Korth and Sudarshan16.8Database System Concepts 3rd Edition
The Two-Phase Locking Protocol
（ 两段锁协议）
? This is a protocol which ensures conflict-serializable
schedules.
? Phase 1,Growing Phase（ 增长阶段）
?transaction may obtain locks
?transaction may not release locks
? Phase 2,Shrinking Phase（ 缩减阶段）
?transaction may release locks
?transaction may not obtain locks
? The protocol assures serializability,It can be proved that the
transactions can be serialized in the order of their lock
points 封锁点 (i.e,the point where a transaction acquired its
final lock),
?Silberschatz,Korth and Sudarshan16.9Database System Concepts 3rd Edition
The Two-Phase Locking Protocol (Cont.)
? Two-phase locking does not ensure freedom from
deadlocks
? Cascading roll-back is possible under two-phase locking,
To avoid this,follow a modified protocol called strict two-
phase locking（ 严格两段锁）, Here a transaction must
hold all its exclusive locks till it commits/aborts.
? Rigorous two-phase locking（ 强两段锁） is even
stricter,here all locks are held till commit/abort,In this
protocol transactions can be serialized in the order in which
they commit.
?Silberschatz,Korth and Sudarshan16.10Database System Concepts 3rd Edition
The Two-Phase Locking Protocol (Cont.)
?Silberschatz,Korth and Sudarshan16.11Database System Concepts 3rd Edition
Lock Conversions（ 锁的转换）
? Two-phase locking with lock conversions:
– First Phase,
?can acquire a lock-S on item
?can acquire a lock-X on item
?can convert a lock-S to a lock-X (upgrade)
– Second Phase:
?can release a lock-S
?can release a lock-X
?can convert a lock-X to a lock-S (downgrade)
? This protocol assures serializability,But still relies on the
programmer to insert the various locking instructions.
?Silberschatz,Korth and Sudarshan16.12Database System Concepts 3rd Edition
Lock Conversions（ 锁的转换）
?Silberschatz,Korth and Sudarshan16.13Database System Concepts 3rd Edition
Graph-Based Protocols（基于图的协议）
? Graph-based protocols are an alternative to two-
phase locking
? Impose a partial ordering ? on the set D = {d1,d2,...,
dh} of all data items.
?If di ? dj then any transaction accessing both di
and dj must access di before accessing dj.
?Implies that the set D may now be viewed as a
directed acyclic graph,called a database graph.
? The tree-protocol is a simple kind of graph protocol,
?Silberschatz,Korth and Sudarshan16.14Database System Concepts 3rd Edition
Tree Protocol（树形协议）
The first lock by Ti may be on any data item,
? Subsequently,a data Q can be locked by Ti only if the parent of
Q is currently locked by Ti.
? Data items may be unlocked at any time.
? A data item that has been locked and unlocked by Ti cannot
subsequently be relocked by Ti
加锁指令只有 lock-X
事务 T的首次加锁可以对任何
数据项进行 此后，事务 T对数据项 Q加锁的前提是事
务 T持有 Q的双亲数据项上的锁
对数据项解锁可以随时进行
数据项被事务 T加锁并解锁之后
，就不能再对该数据项加锁
?Silberschatz,Korth and Sudarshan16.15Database System Concepts 3rd Edition
Tree Protocol
?Silberschatz,Korth and Sudarshan16.16Database System Concepts 3rd Edition
Tree Protocol(Cont.)
? Unlocking may occur earlier in the tree-locking
protocol than in the two-phase locking protocol.
?shorter waiting times,and increase in concurrency
?protocol is deadlock-free,no rollbacks are required
? However,in the tree-locking protocol,a transaction
may have to lock data items that it does not access.
?increased locking overhead,and additional waiting
time
?potential decrease in concurrency
?Silberschatz,Korth and Sudarshan16.17Database System Concepts 3rd Edition
Timestamp-Based Protocols (基于时间戳的协议 )
? Each transaction is issued a timestamp when it enters the
system,If an old transaction Ti has time-stamp TS(Ti),a new
transaction Tj is assigned time-stamp TS(Tj) such that TS(Ti)
<TS(Tj),
? The protocol manages concurrent execution such that the
time-stamps determine the serializability order.
? In order to assure such behavior,the protocol maintains for
each data Q two timestamp values:
?W-timestamp(Q) is the largest time-stamp of any
transaction that executed write(Q) successfully.
?R-timestamp(Q) is the largest time-stamp of any
transaction that executed read(Q) successfully.
?Silberschatz,Korth and Sudarshan16.18Database System Concepts 3rd Edition
Timestamp-Based Protocols (Cont.)
? The timestamp ordering protocol ensures that any
conflicting read and write operations are executed in
timestamp order.
? Suppose a transaction Ti issues a read(Q)
1,If TS(Ti) ? W-timestamp(Q),then Ti needs to read a value
of Q that was already overwritten,Hence,the read
operation is rejected,and Ti is rolled back.
2,If TS(Ti)? W-timestamp(Q),then the read operation is
executed,and R-timestamp(Q) is set to the maximum of
R-timestamp(Q) and TS(Ti).
?Silberschatz,Korth and Sudarshan16.19Database System Concepts 3rd Edition
Timestamp-Based Protocols (Cont.)
? Suppose that transaction Ti issues write(Q).
? 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 write
operation is rejected,and Ti is rolled back.
? If TS(Ti) < W-timestamp(Q),then Ti is attempting to write an
obsolete value of Q,Hence,this write operation is rejected,
and Ti is rolled back.
? Otherwise,the write operation is executed,and W-
timestamp(Q) is set to TS(Ti).
?Silberschatz,Korth and Sudarshan16.20Database System Concepts 3rd Edition
Example Use of the Protocol
?Silberschatz,Korth and Sudarshan16.21Database System Concepts 3rd Edition
Example Use of the Protocol
A partial schedule for several data items for transactions with
timestamps 1,2,3,4,5
T1 T2 T3 T4 T5
read(Y) read(X) read(Y)
write(Y)
write(Z)
read(Z)
read(X)
read(X) write(Z)
write(Y)
write(Z)
?Silberschatz,Korth and Sudarshan16.22Database System Concepts 3rd Edition
Thomas’ Write Rule（托马斯写规则）
? When Ti attempts to write data item Q,if TS(Ti) < W-
timestamp(Q),then Ti is attempting to write an obsolete
value of {Q},Hence,rather than rolling back Ti as the
timestamp ordering protocol would have done,this {write}
operation can be ignored.
? Otherwise this protocol is the same as the timestamp
ordering protocol.
? Thomas' Write Rule allows greater potential concurrency,
?Silberschatz,Korth and Sudarshan16.23Database System Concepts 3rd Edition
Validation-Based Protocol
（ 基于有效性检查的协议）
? Execution of transaction Ti is done in three phases.
1,Read phase,Transaction Ti writes only to temporary local
variables
2,Validation phase,Transaction Ti performs a ``validation
test'' to determine if local variables can be written without
violating serializability.
3,Write phase,If Ti is validated,the updates are applied to
the database; otherwise,Ti is rolled back.
? Also called as optimistic concurrency control since
transaction executes fully in the hope that all will go well
during validation
?Silberschatz,Korth and Sudarshan16.24Database System Concepts 3rd Edition
Validation-Based Protocol (Cont.)
? Each transaction Ti has 3 timestamps
? Start(Ti), the time when Ti started its execution
? Validation(Ti),the time when Ti entered its validation phase
? Finish(Ti), the time when Ti finished its write phase
? Serializability order is determined by timestamp given at
validation time,to increase concurrency,Thus TS(Ti) is
given the value of Validation(Ti).
?Silberschatz,Korth and Sudarshan16.25Database System Concepts 3rd Edition
Schedule Produced by Validation
? Example of schedule produced using validation
T14 T15
read(B) read(B)
B:- B-50
read(A)
A:- A+50read(A)
(validate)
display (A+B) (validate)
write (B)
write (A)
?Silberschatz,Korth and Sudarshan16.26Database System Concepts 3rd Edition
Multiple Granularity （ 多粒度）
? Allow data items to be of various sizes and define a
hierarchy of data granularities,where the small
granularities are nested within larger ones
? Can be represented graphically as a tree (but don't
confuse with tree-locking protocol)
? When a transaction locks a node in the tree explicitly,it
implicitly locks all the node's descendents in the same
mode.
? Granularity of locking (level in tree where locking is done):
?fine granularity (lower in tree),high concurrency,high
locking overhead
?coarse granularity (higher in tree),low locking
overhead,low concurrency
?Silberschatz,Korth and Sudarshan16.27Database System Concepts 3rd Edition
Example of Granularity Hierarchy
The highest level in the example hierarchy is the entire
database.
The levels below are of type area,file and record in that order.
?Silberschatz,Korth and Sudarshan16.28Database System Concepts 3rd Edition
Multiversion Schemes （ 多版本机制）
? Multiversion schemes keep old versions of data item to
increase concurrency.
?Multiversion Timestamp Ordering
?Multiversion Two-Phase Locking
? Each successful write results in the creation of a new
version of the data item written.
? Use timestamps to label versions.
? When a read(Q) operation is issued,select an appropriate
version of Q based on the timestamp of the transaction,
and return the value of the selected version,
? reads never have to wait as an appropriate version is
returned immediately.
?Silberschatz,Korth and Sudarshan16.29Database System Concepts 3rd Edition
Deadlock Handling （ 死锁处理）
? Consider the following two transactions:
T1,write (X) T2,write(Y)
write(Y) write(X)
? Schedule with deadlock
T1 T2
lock-X on X
write (X) lock-X on Y
write (X)
wait for lock-X on Xwait for lock-X on Y
?Silberschatz,Korth and Sudarshan16.30Database System Concepts 3rd Edition
Deadlock Handling
? System is deadlocked if there is a set of transactions such
that every transaction in the set is waiting for another
transaction in the set.
? Deadlock prevention（ 死锁预防） protocols ensure that
the system will never enter into a deadlock state,
?Silberschatz,Korth and Sudarshan16.31Database System Concepts 3rd Edition
More Deadlock Prevention Strategies
? Following schemes use transaction timestamps for the sake
of deadlock prevention alone.
? wait-die（ 等待－死亡） scheme — non-preemptive
?older transaction may wait for younger one to release
data item,Younger transactions never wait for older ones;
they are rolled back instead.
?a transaction may die several times before acquiring
needed data item
? wound-wait（ 受伤－死亡） scheme — preemptive
?older transaction wounds (forces rollback) of younger
transaction instead of waiting for it,Younger transactions
may wait for older ones.
?may be fewer rollbacks than wait-die scheme.
?Silberschatz,Korth and Sudarshan16.32Database System Concepts 3rd Edition
Deadlock prevention (Cont.)
? Both in wait-die and in wound-wait schemes,a rolled back
transactions is restarted with its original timestamp,Older
transactions thus have precedence over newer ones,and
starvation is hence avoided.
? Timeout-Based Schemes,
?a transaction waits for a lock only for a specified amount
of time,After that,the wait times out and the transaction
is rolled back.
?thus deadlocks are not possible
?simple to implement; but starvation is possible,Also
difficult to determine good value of the timeout interval.
?Silberschatz,Korth and Sudarshan16.33Database System Concepts 3rd Edition
Deadlock Detection
? Deadlocks can be described as a wait-for graph,which
consists of a pair G = (V,E),
?V is a set of vertices (all the transactions in the system)
?E is a set of edges; each element is an ordered pair Ti
?Tj,
? If Ti ? Tj is in E,then there is a directed edge from Ti to Tj,
implying that Ti is waiting for Tj to release a data item.
? When Ti requests a data item currently being held by Tj,
then the edge Ti Tj is inserted in the wait-for graph,This
edge is removed only when Tj is no longer holding a data
item needed by Ti.
? The system is in a deadlock state if and only if the wait-for
graph has a cycle,Must invoke a deadlock-detection
algorithm periodically to look for cycles.
?Silberschatz,Korth and Sudarshan16.34Database System Concepts 3rd Edition
Deadlock Detection (Cont.)
Wait-for graph without a cycle Wait-for graph with a cycle
?Silberschatz,Korth and Sudarshan16.35Database System Concepts 3rd Edition
Deadlock Recovery
? When deadlock is detected,
?Some transaction will have to rolled back (made a victim)
to break deadlock,Select that transaction as victim that
will incur minimum cost.
?Rollback -- determine how far to roll back transaction
?Total rollback,Abort the transaction and then restart it.
?More effective to roll back transaction only as far as
necessary to break deadlock.
?Starvation happens if same transaction is always chosen
as victim,Include the number of rollbacks in the cost
factor to avoid starvation
?Silberschatz,Korth and Sudarshan16.36Database System Concepts 3rd Edition
Insert and Delete Operations
? If two-phase locking is used,
?A delete operation may be performed only if the
transaction deleting the tuple has an exclusive lock on
the tuple to be deleted.
?A transaction that inserts a new tuple into the database
is given an X-mode lock on the tuple
?Silberschatz,Korth and Sudarshan16.37Database System Concepts 3rd Edition
Insert and Delete Operations (Cont.)
? The transaction scanning the relation is reading information that
indicates what tuples the relation contains,while a transaction
inserting a tuple updates the same information.
? The information should be locked.
? One solution,
? Associate a data item with the relation,to represent the information
about what tuples the relation contains.
? Transactions scanning the relation acquire a shared lock in the data
item,
? Transactions inserting or deleting a tuple acquire an exclusive lock on
the data item,(Note,locks on the data item do not conflict with locks on
individual tuples.)
? Above protocol provides very low concurrency for
insertions/deletions.
? Index locking protocols provide higher concurrency while
preventing the phantom phenomenon,by requiring locks
on certain index buckets,
?Silberschatz,Korth and Sudarshan16.38Database System Concepts 3rd Edition
Index Locking Protocol
? Every relation must have at least one index,Access to a relation must
be made only through one of the indices on the relation.
? A transaction Ti that performs a lookup must lock all the index buckets
that it accesses,in S-mode.
? A transaction Ti may not insert a tuple ti into a relation r without
updating all indices to r.
? Ti must perform a lookup on every index to find all index buckets that
could have possibly contained a pointer to tuple ti,had it existed
already,and obtain locks in X-mode on all these index buckets,Ti must
also obtain locks in X-mode on all index buckets that it modifies.
? The rules of the two-phase locking protocol must be observed.
?Silberschatz,Korth and Sudarshan16.39Database System Concepts 3rd Edition
Weak Levels of Consistency
? Degree-two consistency,differs from two-phase locking in that
S-locks may be released at any time,and locks may be acquired
at any time
? X-locks must be held till end of transaction
? Serializability is not guaranteed,programmer must ensure that no
erroneous database state will occur]
? Cursor stability,
? For reads,each tuple is locked,read,and lock is immediately
released
? X-locks are held till end of transaction
? Special case of degree-two consistency
?Silberschatz,Korth and Sudarshan16.40Database System Concepts 3rd Edition
Weak Levels of Consistency in SQL
? SQL allows non-serializable executions
? Serializable,is the default
? Repeatable read,allows only committed records to be read,and
repeating a read should return the same value (so read locks should
be retained)
? However,the phantom phenomenon need not be prevented
– T1 may see some records inserted by T2,but may not see
others inserted by T2
? Read committed,same as degree two consistency,but most
systems implement it as cursor-stability
? Read uncommitted,allows even uncommitted data to be read
?Silberschatz,Korth and Sudarshan16.41Database System Concepts 3rd Edition
Concurrency in Index Structures
? Indices are unlike other database items in that their only job is to
help in accessing data.
? Index-structures are typically accessed very often,much more
than other database items,
? Treating index-structures like other database items leads to low
concurrency,Two-phase locking on an index may result in
transactions executing practically one-at-a-time.
? It is acceptable to have nonserializable concurrent access to an
index as long as the accuracy of the index is maintained.
? In particular,the exact values read in an internal node of a
B+-tree are irrelevant so long as we land up in the correct leaf
node.
? There are index concurrency protocols where locks on internal
nodes are released early,and not in a two-phase fashion.
?Silberschatz,Korth and Sudarshan16.42Database System Concepts 3rd Edition
Concurrency in Index Structures (Cont.)
? Example of index concurrency protocol:
? Use crabbing instead of two-phase locking on the nodes of the
B+-tree,as follows,During search/insertion/deletion:
? First lock the root node in shared mode.
? After locking all required children of a node in shared mode,release
the lock on the node.
? During insertion/deletion,upgrade leaf node locks to exclusive
mode.
? When splitting or coalescing requires changes to a parent,lock the
parent in exclusive mode.
? Above protocol can cause excessive deadlocks,Better protocols
are available; see Section 16.9 for one such protocol,the B-link
tree protocol
End of Chapter
?Silberschatz,Korth and Sudarshan16.44Database System Concepts 3rd Edition
Tree-Structured Database Graph
?Silberschatz,Korth and Sudarshan16.45Database System Concepts 3rd Edition
Serializable Schedule Under the Tree Protocol
?Silberschatz,Korth and Sudarshan16.46Database System Concepts 3rd Edition
Schedule 5,A Schedule Produced by Using Validation
?Silberschatz,Korth and Sudarshan16.47Database System Concepts 3rd Edition
Granularity Hierarchy
?Silberschatz,Korth and Sudarshan16.48Database System Concepts 3rd Edition
Compatibility Matrix
?Silberschatz,Korth and Sudarshan16.49Database System Concepts 3rd Edition
Nonserializable Schedule with Degree-Two
Consistency
?Silberschatz,Korth and Sudarshan16.50Database System Concepts 3rd Edition
B+-Tree For account File with n = 3.
?Silberschatz,Korth and Sudarshan16.51Database System Concepts 3rd Edition
Insertion of,Clearview” Into the B+-Tree of Figure
16.21
?Silberschatz,Korth and Sudarshan16.52Database System Concepts 3rd Edition
Lock-Compatibility Matrix
