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Chapter 18: Parallel Databases
Database System Concepts, 6th Ed.
©Silberschatz, Korth and Sudarshan
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Database System Concepts
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Chapter 1: Introduction
Part 1: Relational databases
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Chapter 2: Introduction to the Relational Model
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Chapter 3: Introduction to SQL
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Chapter 4: Intermediate SQL
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Chapter 5: Advanced SQL
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Chapter 6: Formal Relational Query Languages
Part 2: Database Design
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Chapter 7: Database Design: The E-R Approach
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Chapter 8: Relational Database Design
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Chapter 9: Application Design
Part 3: Data storage and querying
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Chapter 10: Storage and File Structure
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Chapter 11: Indexing and Hashing
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Chapter 12: Query Processing
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Chapter 13: Query Optimization
Part 4: Transaction management
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Chapter 14: Transactions
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Chapter 15: Concurrency control
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Chapter 16: Recovery System
Part 5: System Architecture
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Chapter 17: Database System Architectures
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Chapter 18: Parallel Databases
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Chapter 19: Distributed Databases
Database System Concepts - 6th Edition
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Part 6: Data Warehousing, Mining, and IR
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Chapter 20: Data Mining
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Chapter 21: Information Retrieval
Part 7: Specialty Databases
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Chapter 22: Object-Based Databases
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Chapter 23: XML
Part 8: Advanced Topics
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Chapter 24: Advanced Application Development
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Chapter 25: Advanced Data Types
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Chapter 26: Advanced Transaction Processing
Part 9: Case studies
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Chapter 27: PostgreSQL
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Chapter 28: Oracle
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Chapter 29: IBM DB2 Universal Database
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Chapter 30: Microsoft SQL Server
Online Appendices
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Appendix A: Detailed University Schema
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Appendix B: Advanced Relational Database Model
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Appendix C: Other Relational Query Languages
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Appendix D: Network Model
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Appendix E: Hierarchical Model
18.2
©Silberschatz, Korth and Sudarshan
Chapter 18: Parallel Databases
 18.1 Introduction
 18.2 I/O Parallelism
 18.3 Interquery Parallelism
 18.4 Intraquery Parallelism
 18.5 Intraoperation Parallelism
 18.6 Interoperation Parallelism
 18.7 Query Optimization
 18.8 Design of Parallel Systems
 18.9 Parallelism on Multicore Processors
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Introduction
 Parallel machines are becoming quite common and affordable

Prices of microprocessors, memory and disks have dropped sharply
 Databases are growing increasingly large

large volumes of transaction data are collected and stored for later analysis.

multimedia objects like images are increasingly stored in databases
 Large-scale parallel database systems increasingly used for:

storing large volumes of data

processing time-consuming decision-support queries

providing high throughput for transaction processing
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Parallelism in Databases
 Data can be partitioned across multiple disks for parallel I/O
 Different queries can be run in parallel with each other (Inter-Query Parallelism)

Concurrency control takes care of conflicts
 Queries are expressed in high level language SQL, then translated to relational
algebra

Individual relational operations (e.g., sort, join, aggregation) can be executed
in parallel (Intra-Query Parallelism)

data can be partitioned and each processor can work independently on its
own partition.
 Thus, databases naturally lend themselves to parallelism

Potential parallelism is everywhere in database processing
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Chapter 18: Parallel Databases
 18.1 Introduction
 18.2 I/O Parallelism
 18.3 Interquery Parallelism
 18.4 Intraquery Parallelism
 18.5 Intraoperation Parallelism
 18.6 Interoperation Parallelism
 18.7 Query Optimization
 18.8 Design of Parallel Systems
 18.9 Parallelism on Multicore Processors
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I/O Parallelism
 Reduce the time required to retrieve relations from disk by partitioning the relations
on multiple disks.
 Horizontal partitioning – tuples of a relation are divided among many disks such
that each tuple resides on one disk. (number of disks = n):
Round-robin partitioning: Send the ith tuple inserted in the relation to disk i mod n.
Hash partitioning:
 Choose one or more attributes as the partitioning attributes.
 Choose hash function h with range 0…n - 1
 Let i denote result of hash function h applied to the partitioning attribute value
of a tuple. Send tuple to disk i.
Range partitioning:
 Choose an attribute v as the partitioning attribute
 A partitioning vector [vo, v1, ..., vn-2] is chosen
 Tuples such that vi  v  vi+1 go to disk i + 1
 Tuples with v < v0 go to disk 0
 Tuples with v  vn-2 go to disk n-1.
E.g., with a partitioning vector [5,11] and 3 disks, a tuple with value 2 goes to disk
0, a tuple with value 8 goes to disk 1, while a tuple with value 20 goes to disk2.
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Comparison of Partitioning Techniques
 Evaluate how well partitioning techniques support the following types of data
access in a parallel fashion:
1.Scanning the entire relation – scan queries
2.Locating a tuple associatively – point queries (E.g., r.A = 25)
3.Locating all tuples such that the value of a given attribute lies within a specified
range – range queries (E.g., 10  r.A < 25)
Round robin partitioning:
 Best suited for sequential scan of entire relation on each query.
 All disks have almost an equal number of tuples
 Retrieval work for entire relation is thus well balanced between disks
 Point queries and Range queries are difficult to process
 No clustering -- tuples are scattered across all disks
p1
pn
p2
Given Data
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Comparison of Partitioning Techniques (Cont.)
Hash partitioning:

Good for sequential access
 Assuming hash function is good, and partitioning attributes form a key, tuples
will be equally distributed between disks

Retrieval work for entire relation is then well balanced between disks.
 Good for point queries on partitioning attribute
 Can lookup single disk, leaving others available for answering other queries.
 Index on partitioning attribute can be local to disk, making lookup and update
more efficient
 No clustering, so difficult to answer range queries
p1
p2
pn
Hashing Function H
Given Data
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Comparison of Partitioning Techniques (Cont.)
Range partitioning:
 Provides data clustering by partitioning attribute value
 Good for sequential access
 Good for point queries on partitioning attribute

only one disk needs to be accessed.
 For range queries on partitioning attribute, one to a few disks may need to be
accessed
 Remaining disks are available for other queries.
 Good if result tuples are from one to a few blocks.
 If many blocks are to be fetched and they are still fetched from one to a few
disks, and potential parallelism in disk access is wasted
 Example of execution skew
 Round-robin or Hash partitioning might be better for this case
p1
p2
pn
Given Data
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Handling of Skew Problem
 Partitioning a Relation across Disks

If a relation contains only a few tuples which will fit into a single disk block,
then assign the relation to a single disk.
 Large relations are preferably partitioned across all the available disks.
 If a relation consists of m disk blocks and there are n disks available in the
system, then the relation should be allocated min(m,n) disks.
 The distribution of tuples to disks may be skewed
 Some disks have many tuples, while others may have fewer tuples
 Types of skew:
 Attribute-value skew
 All the tuples with the same value for the partitioning attribute end up in
the same partition
 Can occur with range-partitioning and hash-partitioning
 Partition skew
 With range-partitioning, badly chosen partition vector may assign too
many tuples to some partitions and too few to others
 Less likely with hash-partitioning if a good hash-function is chosen
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Handling Skew in Range-Partitioning
 To create a balanced partitioning vector (assuming partitioning attribute forms a key
of the relation):

Sort the relation on the partitioning attribute.

Construct the partition vector by scanning the relation in sorted order as follows.

After every 1/nth of the relation has been read, the value of the partitioning
attribute of the next tuple is added to the partition vector.

n denotes the number of partitions to be constructed.

Duplicate entries or imbalances can result if duplicates are present in partitioning
attributes.
1
Partioning attribute
3
n=3
balanced partitioning vector
4
1..4
7
7..11
9
12..15
..
15
 Alternative technique based on histograms used in practice
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Handling Skew using Histograms
 Balanced partitioning vector can be constructed from histogram in a relatively
straightforward fashion

Assume uniform distribution within each range of the histogram

Histogram can be constructed by scanning relation, or sampling (blocks
containing) tuples of the relation

Histograms can be stored in the system catalog
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Handling Skew Using Virtual Processor
Partitioning
 Skew in range partitioning can be handled elegantly using virtual processor
partitioning:

create a large number of partitions (say 10 to 20 times the number of
processors)

Assign virtual processors to partitions either in round-robin fashion or based
on estimated cost of processing each virtual partition
 Basic idea:

If any normal partition would have been skewed, it is very likely the skew is
spread over a number of virtual partitions

Skewed virtual partitions get spread across a number of processors, so work
gets distributed evenly!
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Virtual Processor Partitioning
Given Data
A...E
F...J
K...N
O...Z
Virtual processors
VP1
Real processors
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P1
VP3
P2
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VP5
Pn
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Chapter 18: Parallel Databases
 18.1 Introduction
 18.2 I/O Parallelism
 18.3 Interquery Parallelism
 18.4 Intraquery Parallelism
 18.5 Intraoperation Parallelism
 18.6 Interoperation Parallelism
 18.7 Query Optimization
 18.8 Design of Parallel Systems
 18.9 Parallelism on Multicore Processors
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Interquery Parallelism
 Different queries / transactions execute in parallel with one another
 Increases transaction throughput

used primarily to scale up a transaction processing system to support a
larger number of transactions per second
 Can use single-processor version of DBMS without drastic changes?

What about concurrency control

What about recovery

Many local memories may cause consistency problem
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Interquery Parallelism (cont.)
 Shared-memory parallel database is easiest form of parallelism to support
because even sequential database systems support concurrent processing
 Single-processor version of DBMS can be used without drastic changes
 More complicated to implement on shared-disk or shared-nothing architectures

Locking and logging must be coordinated by passing messages between
processors.
 Data in a local buffer may have been updated at another processor
 Cache-coherency has to be maintained — reads and writes of data in
buffer must find latest version of data

Cache-coherency protocol may need to be combined with concurrency
control
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Cache Coherency Protocol in Parallel Database
 Example of a cache coherency protocol for shared disk systems:

Before reading/writing to a page, the page must be locked in shared/exclusive
mode.

On locking a page, the page must be read from disk

Before unlocking a page, the page must be written to disk if it was modified.
 More complex protocols with fewer disk reads/writes exist
 Cache coherency protocols for shared-nothing systems are similar.

Each database page is assigned a home processor.

Requests to fetch the page or write it to disk are sent to the home processor.
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Chapter 18: Parallel Databases
 18.1 Introduction
 18.2 I/O Parallelism
 18.3 Interquery Parallelism
 18.4 Intraquery Parallelism
 18.5 Intraoperation Parallelism
 18.6 Interoperation Parallelism
 18.7 Query Optimization
 18.8 Design of Parallel Systems
 18.9 Parallelism on Multicore Processors
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Intraquery Parallelism
 Execution of a single query in parallel on multiple processors / disks

important for speeding up long-running queries.
 Two complementary forms of intraquery parallelism :

Intra-operation Parallelism – parallelize the execution of each individual
operation in the query


This form scales better with increasing parallelism because the number
of tuples processed by each operation is typically more than the
number of operations in a query
Inter-operation Parallelism – execute the different operations in a query
expression in parallel.
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Parallel Processing of Relational Operations
 Our discussion of parallel algorithms assumes:

read-only queries

shared-nothing architecture

n processors, P0, ..., Pn-1, and n disks D0, ..., Dn-1, where Di  Pi.
 If a processor has multiple disks they can simply simulate a single disk Di.
 Shared-nothing architectures can be efficiently simulated on shared-memory
and shared-disk systems.

Algorithms for shared-nothing systems can thus be run on shared-memory
and shared-disk systems.

However, some optimizations may be possible.
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Chapter 18: Parallel Databases
 18.1 Introduction
 18.2 I/O Parallelism
 18.3 Interquery Parallelism
 18.4 Intraquery Parallelism
 18.5 Intraoperation Parallelism
 18.6 Interoperation Parallelism
 18.7 Query Optimization
 18.8 Design of Parallel Systems
 18.9 Parallelism on Multicore Processors
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Parallel Sort
Range-Partitioning Sort
 Choose processors P0, ..., Pm, where m  n -1 to do sorting.
 Create range-partition vector with m entries, on the sorting attributes
 Redistribute the relation using range partitioning

All tuples that lie in the ith range are sent to processor Pi

Pi stores the tuples it received temporarily on disk Di.

This step requires I/O and communication overhead.
 Each processor Pi sorts its partition of the relation locally.
 Each processors executes same operation (sort) in parallel with other
processors, without any interaction with the others (data parallelism).
 Final merge operation is trivial

range-partitioning ensures that, for 1  i < j  m, the key values in
processor Pi. are all less than the key values in Pj.
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Range-Partitioning Sort
Pn
D0
P1
Sorts its partition locally
P2
Local
sort
D1
Local
sort
D2
P3
Local
sort
D3
Range partitioning
P0
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Parallel Sort (Cont.)
Parallel External Sort-Merge
 Assume the relation has already been partitioned among disks D0, ..., Dn-1 (in
whatever manner)
 Each processor Pi locally sorts the data on disk Di
 The sorted runs on each processor are then merged to get the final sorted output.
 Parallelize the merging of sorted runs as follows:

The sorted partitions at each processor Pi are range-partitioned across the
processors P0, ..., Pm-1

Each processor Pi performs a merge on the streams as they are received, to
get a single sorted run

The sorted runs on processors P0,..., Pm-1 are concatenated to get the final
result
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Parallel External Sort-Merge
Pn
D0 : concatenated run
Merge the sorted runs
P3
P2
P1
Each Di has a sorted run
D2
D1
D3
Range partitioning
Sorts its partition locally
Local
sort
Local
sort
D2
D1
Local
sort
D3
※ Assume the relation has already been partitioned
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Parallel Join
 The join operation requires pairs of tuples to be tested to see if they satisfy
the join condition, and if they do, the pair is added to the join output.
 Parallel Join algorithms

Split the pairs to be tested over several processors

Each processor then computes part of the join locally

In a final step, the results from each processor can be collected together
to produce the final result
 Partitioned Join
 Fragment-and-Replicate Join
 Partitioned Parallel Hash-Join
 Parallel Nested-Loop Join
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Partitioned Join
 For equi-joins and natural joins, it is possible to partition the two input relations
across the processors, and compute the join locally at each processor
 Let r and s be the input relations, and we want to compute r
r.A=s.B
s
 r and s are partitioned into n partitions, denoted r0, r1, ..., rn-1 and s0, s1, ..., sn-1

Can use either range partitioning or hash partitioning.

r and s must be partitioned on their join attributes (r.A and s.B), using the
same range-partitioning vector or hash function
 Partitions ri and si are sent to processor Pi
 Each processor Pi locally computes ri

ri.A=si.B si
Any of the standard join methods can be used.
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Partitioned Join (Cont.)
Range partitioning
or Hash partitioning
on join attributes
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Fragment-and-Replicate Join
 Partitioned join is not possible for some join conditions

e.g., non-equijoin conditions, such as r.A > s.B.

For joins where partitioning is not applicable, parallelization can be
accomplished by fragment and replicate technique

Depicted on next slide
 Special case – asymmetric fragment-and-replicate:

One of the relations, say r, is partitioned

any partitioning technique can be used.

The other relation, s, is replicated across all the processors

Processor Pi then locally computes the join of ri with all of s using any join
technique.
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Fragment-and-Replicate Join (Cont.)
 General case: reduces the sizes of the relations at each processor

r is partitioned into n partitions,r0, r1, ..., r n-1

s is partitioned into m partitions, s0, s1, ..., sm-1

Any partitioning technique may be used.

There must be at least m * n processors

Label the processors as P0,0, P0,1, ..., P0,m-1, P1,0, ..., Pn-1m-1

Pi,j computes the join of ri with sj

In order to do so, ri is replicated to Pi,0, Pi,1, ..., Pi,m-1, while si is replicated
to P0,i, P1,i, ..., Pn-1,i

Any join technique can be used at each processor Pi,j.
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Fragment-and-Replicate Join (Cont.)
 Both versions of fragment-and-replicate work with any join condition, since
every tuple in r can be tested with every tuple in s.
 Usually has a higher cost than partitioned join, since one of the relations (for
asymmetric fragment-and-replicate) or both relations (for general fragmentand-replicate) have to be replicated.
 Sometimes asymmetric fragment-and-replicate is preferable even though
partitioning could be used.

E.g., Suppose s is small and r is large, and already partitioned

It may be cheaper to replicate s across all processors, rather than
repartition r and s on the join attributes.
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Depiction of Fragment-and-Replicate Joins
S replicated
r0 replicated
s0 replicated
When partitioned join is not possible!
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Partitioned Parallel Hash-Join
Parallelizing partitioned hash join:
 Assume s is smaller than r and therefore s is chosen as the build relation.
 A hash function h1 takes the join attribute value of each tuple in s and maps this
tuple to one of the n processors.
 Each processor Pi reads the tuples of s that are on its disk Di, and sends each
tuple to the appropriate processor based on hash function h1.

Let si denote the tuples of relation s that are sent to processor Pi.
 As tuples of relation s are received at the destination processors, they are
partitioned further using another hash function, h2, which is used to compute the
hash-join locally. (Cont.)
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Partitioned Parallel Hash-Join (Cont.)
 Once the tuples of s have been distributed, the larger relation r is redistributed
across the m processors using the hash function h1

Let ri denote the tuples of relation r that are sent to processor Pi.
 As the r tuples are received at the destination processors, they are repartitioned
using the function h2

(just as the probe relation is partitioned in the sequential hash-join algorithm).
 Each processor Pi executes the build and probe phases of the hash-join algorithm
on the local partitions ri and si of r and s to produce a partition of the final result
of the hash-join.
 Note: Hash-join optimizations can be applied to the parallel case

e.g., the hybrid hash-join algorithm can be used to cache some of the
incoming tuples in memory and avoid the cost of writing them and reading
them back in.
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Partitioned Parallel Hash-Join
Relation R
OUTPUT
1
Partitions
Pr1
R1
2
INPUT
hash
function
...
h1
R2
i
Ri
Partition both
relations using
hash function h1 Relation S
OUTPUT
1
2
INPUT
...
h1
Pr3
Partitions
Ps1
S1
S2
hash
function
Pr2
i
Si
Ps2
Ps3
main memory buffers
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Partitioned Parallel Hash-Join
Pi
Partitions
of R
Hash table for partition
Si
Partitions
of S
h2
h2
Read in a
partition of R,
hash it using h2
Input buffer
Ri
Output
buffer
main memory buffers
Pn
Disk
Disk
Join Result
Disk
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Parallel Nested-Loop Join
 Assume that

Relation s is much smaller than relation r and that r is stored by partitioning.

There is an index on a join attribute of relation r at each of the partitions of
relation r.
 Use asymmetric fragment-and-replicate join, with relation s being replicated, and
using the existing partitioning of relation r.
 Each processor Pj where a partition of relation s is stored reads the tuples of
relation s stored in Dj, and replicates the tuples to every other processor Pi.

At the end of this phase, relation s is replicated at all sites that store tuples of
relation r.
 Each processor Pi performs an indexed nested-loop join of relation s with the ith
partition of relation r.
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Parallel Nested-Loop Join
R
Join attribute A
Partitions
P1
Replicate of S
INPUT
R1
1
2
R1
S
R2
S
INPUT
S
...
...
i
S
Ri
Output
buffer
Disk
Disk
A..Z
Disk
Disk
Index nested loop join
Pi
Join Result
Asymmetric fragment + replicate join
Disk
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Parallel Selection
Selection (r)
 If  is of the form ai = v, where ai is an attribute and v a value.

If r is partitioned on ai the selection is performed at a single processor
 If  is of the form l < ai < u (i.e.,  is a range selection) and the relation has
been range-partitioned on ai

Selection is performed at each processor whose partition overlaps with the
specified range of values
 In all other cases: the selection is performed in parallel at all the processors

E = 3
E = 3

[R1: E < 10]
Database System Concepts - 6th Edition
[R2: E ≥ 10]
[R1: E < 10]
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E = 3
Ø
[R2 : E ≥ 10]
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Duplicate Elimination and Parallel Projection
 Duplicate elimination

Perform by using either of the parallel sort techniques


eliminate duplicates as soon as they are found during sorting.
Can also partition the tuples (using either range-partitioning or hashpartitioning) and perform duplicate elimination locally at each processor.
 Projection

Projection without duplicate elimination can be performed as tuples are
read in from disk in parallel.

If duplicate elimination is required, any of the above duplicate elimination
techniques can be used.
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Parallel Grouping/Aggregation
 Partition the relation on the grouping attributes and then compute the aggregate
values locally at each processor.
 Can reduce cost of transferring tuples during partitioning by partly computing
aggregate values before partitioning.
 Consider the sum aggregation operation:

Perform aggregation operation at each processor Pi on those tuples stored
on disk Di


results in tuples with partial sums at each processor.
Result of the local aggregation is partitioned on the grouping attributes, and
the aggregation performed again at each processor Pi to get the final result.
 Fewer tuples need to be sent to other processors during partitioning.
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Parallel Grouping/Aggregation
P1
P2
P3
P4
P5
sum
Partly computing
sum
sum
sum
sum
sum
D1
D2
D3
D4
D5
Grouping partitioning
P0
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Cost of Parallel Evaluation of Operations
 If there is no skew in the partitioning, and there is no overhead due to the
parallel evaluation, expected speed-up will be 1/n
 If skew and overheads are also to be taken into account, the time taken by a
parallel operation can be estimated as
Tpart + Tasm + max (T0, T1, …, Tn-1)

Tpart is the time for partitioning the relations

Tasm is the time for assembling the results

Ti is the time taken for the operation at processor Pi

this needs to be estimated taking into account the skew, and the time
wasted in contentions.
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Chapter 18: Parallel Databases
 18.1 Introduction
 18.2 I/O Parallelism
 18.3 Interquery Parallelism
 18.4 Intraquery Parallelism
 18.5 Intraoperation Parallelism
 18.6 Interoperation Parallelism
 18.7 Query Optimization
 18.8 Design of Parallel Systems
 18.9 Parallelism on Multicore Processors
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Inter-operator Parallelism: Pipelined Parallelism
 Consider a join of four relations : r1
r2
r3
r4
 Set up a pipeline that computes the three joins in parallel

Let P1 be assigned the computation of temp1 = r1
r2
 And P2 be assigned the computation of temp2 = temp1
r3
 And P3 be assigned the computation of temp2
r4
 Each of these operations can execute in parallel, sending result tuples it
computes to the next operation even as it is computing further results
 Provided a pipelineable join evaluation algorithm (e.g. indexed nested loops
join) is used
P3
P2
r4
r3
r1
r2
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result
P3
P2
P1
P1
tuples matching
r2
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r4
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Inter-operator Parallelism: Pipelined Parallelism
 Factors limiting Utility of Pipelined Parallelism

Pipeline parallelism is useful since it avoids writing intermediate results to disk

Useful with small number of processors, but does not scale up well with more
processors.

One reason is that pipeline chains do not attain sufficient length.

Cannot pipeline operators which do not produce output until all inputs have
been accessed (e.g. aggregate and sort)

Little speedup is obtained for the frequent cases of skew in which one
operator's execution cost is much higher than the others.
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Chapter 18: Parallel Databases
 18.1 Introduction
 18.2 I/O Parallelism
 18.3 Interquery Parallelism
 18.4 Intraquery Parallelism
 18.5 Intraoperation Parallelism
 18.6 Interoperation Parallelism
 18.7 Query Optimization
 18.8 Design of Parallel Systems
 18.9 Parallelism on Multicore Processors
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Inter-operator Parallelism: Independent Parallelism


Consider a join of four relations : r1 r2
r3
r4
 Let P1 be assigned the computation of temp1 = r1
r2
 And P2 be assigned the computation of temp2 = r3
r4
 And P3 be assigned the computation of temp1
temp2
 P1 and P2 can work independently in parallel
 P3 has to wait for input from P1 and P2
– Can pipeline output of P1 and P2 to P3, combining independent
parallelism and pipelined parallelism
Does not provide a high degree of parallelism
 useful with a lower degree of parallelism
 less useful in a highly parallel system
P3
P1
r1
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Query Optimization in Parallel DB
 Query optimization in parallel databases is significantly more complex than query
optimization in sequential databases

Cost models are more complicated, since we must take into account
partitioning costs and issues such as skew and resource contention
 When scheduling an execution tree in parallel system, must decide:

How to parallelize each operation and how many processors to use for it

What operations to pipeline, what operations to execute independently in
parallel, and what operations to execute sequentially, one after the other.
 Determining the amount of resources to allocate for each operation is a problem

E.g., allocating more processors than optimal can result in high
communication overhead.
 Long pipelines should be avoided as the final operation may wait a lot for inputs,
while holding precious resources
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Query Optimization in Parallel DB (Cont.)
 The number of parallel evaluation plans from which to choose is much larger than
the number of sequential evaluation plans.
 Therefore heuristics are needed while optimization
 Two alternative heuristics for choosing parallel plans:
 No pipelining and inter-operation pipelining; just parallelize every operation
across all processors.
 Finding best plan is now much easier --- use standard optimization
technique, but with new cost model
 Volcano parallel database popularize the exchange-operator model
– exchange operator is introduced into query plans to partition and
distribute tuples
– each operation works independently on local data on each processor,
in parallel with other copies of the operation
 First choose most efficient sequential plan and then choose how best to
parallelize the operations in that plan.
 Can explore pipelined parallelism as an option
 Choosing a good physical organization (partitioning technique) is important to
speed up queries.
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Chapter 18: Parallel Databases
 18.1 Introduction
 18.2 I/O Parallelism
 18.3 Interquery Parallelism
 18.4 Intraquery Parallelism
 18.5 Intraoperation Parallelism
 18.6 Interoperation Parallelism
 18.7 Query Optimization
 18.8 Design of Parallel Systems
 18.9 Parallelism on Multicore Processors
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Issues in Design of Parallel Systems
 Parallel loading of data from external sources is needed in order to handle large
volumes of incoming data.
 Resilience to failure of some processors or disks.
 Probability of some disk or processor failing is higher in a parallel system.

Operation (perhaps with degraded performance) should be possible in spite
of failure.
 Redundancy achieved by storing extra copy of every data item at another
processor.
 On-line reorganization of data and schema changes must be supported.

For example, index construction on terabyte databases can take hours or
days even on a parallel system.
 Need to allow other processing (insertions/deletions/updates) to be
performed on relation even as index is being constructed.
 Basic idea: index construction tracks changes and ``catches up'‘ on changes
at the end.
 Also need support for on-line repartitioning and schema changes (executed
concurrently with other processing).
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End of Chapter
Database System Concepts, 6th Ed.
©Silberschatz, Korth and Sudarshan
See www.db-book.com for conditions on re-use
Figure 18.01
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Figure 18.02
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Figure 18.03
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