Title: Distributed Transaction Management
1Distributed Transaction Management
- Jyrki Nummenmaa
- jyrki.nummenmaa_at_cs.uta.fi
2Motivation
- We will pick up some motivating examples from the
world of electronic commerce. - As we will see, electronic commerce is an
application area, where transactionality is
needed, and the application programmers in charge
of this need good knowledge on distributed
transactions. - The following slides will explain discuss those
examples and some of their implications.
3Electronic commerce -business-to-customer
services
- Searching for product information
- Ordering products
- Paying for goods and services
- Providing online customer service
- Delivering services
- Various other business-to-business services
exist, but these are enough for our motivational
purposes...
4Internet Commerce
- A person, running a web browser on a desktop
computer, electronically purchases a set of goods
or services from several vendors at different web
sites. - This person wants either the complete set of
purchases to go through, or none of them.
5Internet Commerce ExampleExhibition Hall
Rental Companies Web Sites
6Technical Problems with Internet Commerce
- Security
- Failure
- Multiple sites
- Protocol problems
- Server product limitations
- Response time
- Heterogeneous systems
7Failures single computer
- Hardware failure
- Software crash
- User switched off the PC
- Active attack
8Failure Additional Problems for Multiple Sites
- Network failure
- Or is it just congestion?
- Or has the remote computer crashed?
- Or is it just running slowly?
- Message loss?
- Denial-of-service attack?
- Typically, these failures are partial.
9Distributed Transaction
- A set of participating processes with local
sub-transactions, distributed to a set of sites,
perform a set of actions. - Server Autonomy - any server can unilaterally
decide to abort the transaction. - All or none of the updates or related operations
should be performed.
10Subtle Difference Transaction
- Traditional data processing (database)
transaction - set of read and update operations collectively
transform the database from one consistent state
to another.
- Electronic Commerce transaction
- set of (any) operations collectively provide the
user with his/her required package
11Distributed business object transaction example
- Arriving to a football stadium with a car, the
customer uses a mobile terminal to buy the ticket
and get a parking place. - Business objects to
- Charge the money from a bank account
- Give access to parking
- Entrance to stadium (writing tickets for
collection at a collection point or just giving a
digital reservation document).
12Distributed business object transaction example
(contd)
(Arriving to a football stadium)
- Why is transactionality needed?
- All-or-nothing situation? Maybe...
- Compensational transactions are difficult - e.g.
once access is given to car park, that is
difficult to roll back.
13Transaction properties -Atomicity
- Atomicity
- Ensures that if several different operations
occur within a single transaction, it can never
be the case that some operations complete if
others cannot complete. - Classic example transfer money from one bank
account to another consisting of a withdraw and a
deposit operations we want both or neither.
14Transaction properties -Isolation
- Isolation
- Ensures that concurrently-executing transactions
do not interfere with each other, in the sense
that each transaction sees a consistent state of
the data often a database. - Prevents from using dirty data.
- Classic example (based on the previous one) The
overall sum of money on the two bank accounts
should not be summed while the txn is running).
15Transaction properties -Durability
- Durability
- Ensures that unless an update transaction is
rolled back, then its changes will affect the
state of the data as seen by subsequently-executin
g transactions. - Data is recorded persistently.
16Typical system architecture
- Front-tier clients
- e.g. web browsers.
- Back-tier servers
- such as database systems, message queue managers,
device drivers, ... - Middle-tier business objects
- each typically serving one client using (and
locking) a number of shared resources from a
number of back-tier servers.
17Traditional distributed DBMS system architecture
- Computers are hard-wired to each other.
- In practice a synchronous system, where a message
timeout means that a computer has crashed. - A transparent centralised database management
system, which the user can see as a single
database. - An application program can use the database as a
single database, thus benefitting from
transparency.
18Main transactional services
- Distributed locking is needed, if replicated data
is needed for exclusive (write) access. - Distributed commit is needed to control the fate
of the transaction in a controlled manner. - Barrier synchronisation can be used to guarantee
a consistent view of the world.
19Implementing transactional services
- As we noticed, a traditional distributed database
system gives a transparent view to the system. It
also takes care of concurrency. - In a modern distributed system, the application
programmer needs to implement a large part of
transactional services. - These services are complicated, and their
implementation is far from being easy.
20Transaction Model
- - We will quite often write txn instead of
transaction.
21Txn model - sites
- We assume that there is a set of sites S1,,Sn.
- All of these sites have a resource manager
controlling the usage of the local resources. - We may know all of these sites before the txn
starts (like a site for each bookstore
sub-branch) or then we may not (like when
previously unknown sites from the Internet may
join in).
22Txn model - subtxns
- The txn needs to access resources on some of
these sites (without loss of generality, all of
them). - For this, there is a local transaction on each
site (transaction Ti on site Si). - The local transaction executes the operations
required on the local site. - To use the local resources, the local transaction
Ti on site Si talks with the local resource
manager Mi.
23Distributed Transactions
- In a distributed transaction there is a set of
subtransactions T1,...,Tk, which are executed on
sites S1,...,Sk. - Each subtransaction manages local resources. The
particular problems of managing distributed
transactions vs. centralised (local) transactions
come from two sources - Data may be replicated to several sites. Lock
management of the replicated data is a particular
problem. - Regardless of whether the data is replicated or
not, there is a need to control the fate of the
distributed transaction using a distributed
commit protocol.
24Failure model - sites
- Sites may fail by crashing, that is, they fail
completely. - Sometimes it is assumed that crashed sites may
recover. In this case usually the resource
managers and the participants have recorded their
actions in persistent memory. - Sometimes it is assumed that the crashed sites do
not recover. - Usual assumption if a site functions, it
functions correctly (instead of e.g. sending
erroneus messages).
25Failure model - messages
- Messages may be delayed.
- Message transfer delays are unpredictable
(asynchronous message-passing) - Messages are transferred eventually.
- Messages between sites are not spontaneously
generated. - Messages do not change in transmission.
26Failure model - messages
- All messages arriving at a site Si from a site Sj
are processed in the order they were sent. - It may be that the network is partitioned, that
is, some sites can not exchange messages. This
may continue for an unpredictable time. - This assumption is by default avoided, since
it is a really hard one. - We will state it explicitly if we want it to
hold. - However, in real world this happens.
27Asynchronous communication
- In a synchronous system, we assume that the
relative speeds of processes and communication
delays are bounded. - In an asynchronous system we do not make such an
assumption. This means that not receiving an
expected message does not mean a failure. - Generally, we assume here that we are dealing
with an asynchronous system.
28Failure detection
- Failure is hard to detect.
- Typically, failure is assumed, if an expected
message does not arrive within the usual time
period. - Timeouts are used.
- Delay may be caused by network congestion.
- Or is the remote computer running slowly?
- Mobile hosts make failure detection even harder,
because it is expected behaviour if they stay
unconnected for an unexpected time.
29Distributed Locking
30Mutual Exclusion (Locking)
- The problem of managing access to a single,
indivisible resource (e.g. a data item) that can
only support one user (or transaction, or
process, or thread, or whatever) at a time.
31Desired properties for solutions
- Safety Mutual exclusion is never violated. (Only
one transaction gets the lock). - This property can not be compromised.
- Liveness Each request will be granted
(eventually). - This property should not be compromised.
- Fairness Access to the resource should happen in
the order of requests. - This property is to be discussed later.
32Coordinator-based solutions
- There is a coordinator to control access.
- Coordinator is a process on one of the sites. (It
is none of the transactions.) - Let A be a data item.
- When a transaction needs access, that transaction
sends a request to coordinator. The request is
X(A) exclusively lock A. - The coordinator queues requests.
33Coordinator-based solutions
- When the resource is available, the coordinator
sends a grant message to the transaction T first
in the queue. We write G(X(A)) Grant X(A) - When T sees the grant message, it may use the
resource. - When T does need the resource anymore, it sends a
release message to the coordinator. R(A)
release A.
34An example
T
T
T
C
Lock request list
X(A)
- - T T,T T - -
X(A)
G(X(A))
R(A)
X(A)
G(X(A))
R(A)
G(X(A))
R(A)
35Coordinator-based solutions / properties
- These coordinator-based solutions obviously have
the safety and the liveness properties, if the
coordinator is correctly implemented. - We can argue that they are also fair, since
requests are queued. The ordering (and fairness)
only takes place at the coordinators site
(request arrival, not request departure). More on
that later. - Since lock management is centralised, different
lock types need no special attention.
36Coordinator-based solutions / weaknesses
- The system does not tolerate a crashing
coordinator. - The coordinator may become a bottleneck for
performance. - Suppose data is replicated, there is a local
copy, and the coordinator is not on the local
site. Then we always need to communicate over the
network, which reduces the benefits of having a
local copy.
37Primary copy for replicated data
- If data is not replicated, then to use a data
item, you must contact the site containing the
item. - If the resource manager at that site acts as the
coordinator giving locks for its items,
communication is simple. - If the data is replicated, then we can have a
primary copy, which is accessed for locking.
The resource manager at the site of the primary
copy is the coordinator.
38Token-based algorithms for resource management
- In the token-based algorithms, there is a token
to represent the permission. - Whoever has the token, has the permission, and
can pass it on. - These algorithms are more suitable to share a
resource like a printer, a car park gate, etc
than for a huge database. Lets see why
39Perpetuum mobile
- The token travels around (say, a ring).
- When a process receives the token, it may use the
resource, if it so wishes. - Then the process passes the token on.
TOKEN
40Token-asking algorithms
- The token does not travel around if it is not
needed. - When a process needs the token, it asks for it.
- Requests are queued.
41Analysis of token-based algorithms
- Safety ok.
- Liveness ok.
- Fairness in a way ok.
- Drawbacks
- Token-based algorithms are vulnerable to
single-site failures - Token management may be complicated and/or
consume lots of resources, if there are lots of
resources to be managed.
42Voting-based algorithms
- We assume here that we know a set or resource
managers (say, M1,,Mn), which hold a replicated
data item. - When transaction T needs access to the shared
resource, it will send a message to M1,,Mn
asking for the permission. - Each M1,,Mn will answer G(X(A)) meaning a Yes
vote or N(X(A)) meaning a No vote. - T waits until the replies are in.
- If there are enough Yes votes, T will get the
lock.
43A voting example
M1
T1
T2
M2
X(A)
X(A)
X(A)
G(X(A))
G(X(A))
X(A)
N(X(A))
N(X(A))
44How many votes you need?
- Suppose we have n resource managers, and we want
k Yes votes for an exclusive lock (write-lock)
and m No votes for a shared lock (read-lock). - To avoid two simultaneous exclusive locks, we
must have k gt n/2. - To avoid simultaneously having an exclusive and a
shared lock, must have k m gt n. - If read-operations dominate, then we may choose
m1 and kn. - Notice that we may choose to consult more
resource managers than the above minumum number.
45Which resource managers to consult?
- In principle, it could be enough to ask only a
subset (like a majority) of processes for a
permission. - This subset could be statistically defined, given
a data item. - However, as it might be advantageous to contact
near-by resource managers, the set may well
depend on who is asking.
46Example
- Suppose we operate an airline with offices (and
resource managers) in Tampere, Santiago de Chile
and London. - It seems reasonable to replicate timetables and
use m1, kn, since that information does not
change that often. - For ticket booking, primary copy may be more
appropriate. By statistical analysis we may get
to know, where people (geographically) book which
flights, to choose the placement of each primary
copy.
47Who needs to give permission?
- If we need a permission from all resource
managers, then we do not tolerate site failures
(all the downsides of having a coordinator plus
all the extra effort of contacting all the
resource managers). - Generally, a majority (of all resource managers)
is enough. - There are also ways other than simple majority or
unanimous vote, but one has to be careful to
preserve the mutual exclusion.
48A problematic voting
T2
T1
M1
M2
X(A)
X(A)
X(A)
G(X(A))
R(A)
G(X(A))
N(X(A))
X(A)
N(X(A))
Now what?
49Analysis for voting
- Safety
- Apparently ok, if the numbers are chosen
appropriately. - Liveness
- This far there is nothing to stop the previous
slide situation repeating over and over. - Liveness is not guaranteed unless we make some
improvements. - Fairness
- Nothing appears to guarantee fairness at this
point. - -gt Further improvements are necessary.
50How to re-start after not getting a lock?
- Apparently, something needs to be done to avoid
repeating the situation where no-one gets the
lock. - If we re-start requesting locks, we can tell
younger transactions to wait longer before
re-starting. - However, new transactions may always step in to
stop the oldest transaction from getting the lock
-gt this is not the solution.
51Queueing the requests?
- Instead of just answering the lock requests, the
resource managers can also maintain a lock
request list. - Put the oldest transaction T first in the list
and answer no-one Yes before T has either got and
released the lock or canceled the lock request. - Now, eventually T should get the lock and we are
able to get liveness (and some sort of fairness
as well, although maybe not exactly what we want).
52Using timestamps basic idea
- Give each transaction a timestamp
- Execute the transactions reads and writes.
- If there is a conflict (impossible event compared
to serial execution based on timestamps), roll
back the younger transaction, which is then free
to restart.
53Using timestamps examples
- T1 starts
- T2 starts
- T2 writes X
- T1 is to read X conflict, as T2 should have not
have written this value! - Roll back T2, if it still exists. Otherwise roll
back T1. - Multiversioning solves this.
- T1 starts
- T2 starts
- T2 reads X
- T1 is to write X conflict, as T2 should have
read this new value! - Roll back T2, if it still exists. Otherwise roll
back T1. - Multiversioning does not solve this!
54Distributed timestamps?
- Can be used similarly as centralised timestamps
with the exception that we must be able to order
timestamps globally. - Old trick clock time site id if local clock
times are equal, use site id solve ties.
55Ordering things
- Fairness in both the coordinator-based and
voting-based protocol as well as timestamping
seems to depend on ordering the transactions by
their age. - However, we would need synchronised clocks to do
this. Perfect synchronisation or clocks is not
possible. Good synchronisation can sometimes be
assumed. - Next time we will study logical ordering events
and possibly deadlock management.
56Physical clock synchronisation
57Coordinated universal time
- Atomic clocks based on atomic oscillations are
the most accurate physical clocks. - So-called Coordinated Universal Time based on
atomic time is signaled from radio stations and
satellites. - You can buy a receiver (maybe not more than 100,
I had a look at the web) and get accuracy in the
order of 0.1-10 milliseconds.
58Reasons for and problems in clock synchronisation
- Different clocks work at different speeds.
Therefore, they need to be synchronised at times
(continuously). - Message delay can not be known, but must be
approximated -gt perfect synchronisation can not
be achieved. - Clock skew difference in simultaneous readings.
- Clock drift divergence of clocks because of
different clock speeds.
59External and Internal Synchronisation
- External synchronisation of clock C is
synchronisation with some external source E. If
C-Eltd, then C is accurate (with respect to E)
within the bound d. - Internal synchronisation is synchronisation of
clocks C and C between themselves. If C-Cltd,
then C and C agree within the bound d. C and C
may drift from an external source, but not from
each other.
60Cristians synchronisation method
- A clock at site S is synchronised with a clock at
site S by sending a request MR to S and
receiving a time message MT from S containing
time t. - Round-trip time tR is the time between sending MR
and receiving MT. This is a small time and can be
measured fairly accurately. - A simple estimate S will set its clock to t
tR / 2.
61Accuracy of Cristians synchronisation
- Assume min is shortest time for a message to
travel from S to S (this must be approximated). - When MT arrives to S, the clock of S will read
in the range tmin, ttR-min. This range has
width tR- 2min. - We set the clock of S to t tR/2.
- -gt Accuracy is plus/minus (tR/2 min)
62Problems and improvements
- Problem A single source for time.
- Improvement Poll several servers and e.g. use
the fastest reply. - Problem Faulty time servers.
- Improvement Poll several servers and use
statistics.
63Further improvements
- Berkely time protocol internal synchronisation
with a server polling a number of slaves and
using an average of estimates and sends the
necessary correction to the slaves. - The Network Time Protocol A hierarchy of
servers. Top level UTC, second level
synchronises with top level and so on. More
details at http//www.ntp.org.
64Applications of clocks
- Clocks are needed in timestamp concurrency
control to generate the timestamps! - If we are satisfied with clock accuracy (and
accept the clock skew) then we can use the
physical clock time stamps. - If not, then logical ordering of events needs to
be used.
65Logical clocks
66Logical order
- Using physical clocks to order events is
problematic, because we can not completely
synchronise the clocks. - An alternative solution use a logical
(causality) order.
67What input to use to compute a logical order?
- If e1 happens before e2 on site S, then we write
e1 ltS e2. - If e1 is the sending of message m on some site
and e2 is the receiving of message m on some
site, then we write e1 ltm e2.
68The happens-before relation
- The happens-before relation is denoted by ltH.
- If e1 ltS e2, then e1 ltH e2.
- If e1 ltm e2, then e1 ltH e2.
- If e1 ltH e2 and e2 ltH e3, then e1 ltH e3.
- If happens-before relation does not order two
events, we call them concurrent.
69Happens-before example
- e1 ltS1 e2
- e2 ltS1 e3
- e3 ltS1 e4
- e5 ltS2 e6
- e6 ltS2 e7
- e7 ltS2 e8
- e1 ltm1 e5
- e3 ltm2 e8
- e7 ltm3 e4
- Plus the transitive closure
70The happens-before graph
- The vertices of the happens-before graph are the
events in the system. - The edges are obtainted as followsIf e1 ltS e2
or e1 ltm e2, then there is an edge in the
happens-before graph from e1 to e2. - The closure of the happens-before graph
represents the happens-before relation.
71Happens-before graph example
e1
e5
e2
e6
e7
e3
e4
e8
The transitive closure represents full
information on the logical order
72Lamport timestamps
- Initially, assing 0 to myTS.
- If event e is the receipt of a message m,
then Assign max(m.TS,myTS) to myTS. Add 1 to
myTS. Assign myTS to e.TS. - If event e is the sending of a message m,
then Add 1 to myTS. Assign myTS to both e.TS
and my.TS.
73Find the logical order of events.
T
T
T
T
m1
m2
m3
m4
m5
m6
m7
m8
m9
74Use Lamport timestamps
T
T
T
T
m1
1
2
m2
m3
1
3
4
m4
m5
1
5
4
5
m6
6
8
7
m7
9
m8
10
12
11
m9
13
14
75Lamport timestamps - properties
- Lamport timestamps guarantee that if eltH e', then
e.TS lt e'.TS - This follows from the definition
of happens-before relation by observing the path
of events from e to e. - Lamport timestamps do not guarantee that if e.TS
lt e'.TS, then e ltH e' (why?).