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©Silberschatz, Korth and Sudarshan13.1Database System Concepts
Chapter 13: Query ProcessingChapter 13: Query Processing
Overview
Measures of Query Cost
Selection Operation
Sorting
Join Operation
Other Operations
Evaluation of Expressions
©Silberschatz, Korth and Sudarshan13.2Database System Concepts
Basic Steps in Query ProcessingBasic Steps in Query Processing
1. Parsing and translation
2. Optimization
3. Evaluation
©Silberschatz, Korth and Sudarshan13.3Database System Concepts
Basic Steps in Query Processing Basic Steps in Query Processing (Cont.)(Cont.)
Parsing and translation translate the query into its internal form (based on relational
algebra)
Parser checks syntax, verifies relation names
Evaluation The query-execution engine takes a query-evaluation plan,
executes that plan, and returns the answers to the query.
©Silberschatz, Korth and Sudarshan13.4Database System Concepts
Basic Steps in Query Processing : Basic Steps in Query Processing : OptimizationOptimization
A relational algebra expression may have many equivalent expressions
E.g., balance2500(balance(account)) is equivalent to
balance(balance2500(account))
A relational-algebra expression can be evaluated in many ways
Evaluation plan Annotated expression specifying detailed evaluation strategy
E.g., use an index on balance to find accounts with balance < 2500,
or perform complete relation scan and discard accounts with balance 2500
©Silberschatz, Korth and Sudarshan13.5Database System Concepts
Basic Steps: Optimization (Cont.)Basic Steps: Optimization (Cont.)
Query Optimization Choose the evaluation plan with the lowest cost
Cost is estimated using statistical information from the database catalog
e.g. number of tuples in each relation, size of tuples, etc.
This chapter shows How to measure query costs
Algorithms for evaluating relational algebra operations
How to combine algorithms for individual operations in order to evaluate a complete expression
Chapter 14 Query optimization
©Silberschatz, Korth and Sudarshan13.6Database System Concepts
Measures of Query CostMeasures of Query Cost Cost is generally measured as total elapsed time for
answering query Many factors contribute to time cost
disk accesses, CPU, or communication time
Typically disk access is the dominant cost, and is relatively easy to estimate. Number of seeks * average seek time
Number of blocks read * average block read time
Number of blocks written * average block write time
Writing is more expensive than reading
– Data is read back after being written to ensure that the write was successful
©Silberschatz, Korth and Sudarshan13.7Database System Concepts
Measures of Query Cost (Cont.)Measures of Query Cost (Cont.) For simply, use number of block transfers from disk as the cost
measure Ignore the difference between sequential and random I/O
Ignore CPU cost
Ignore cost to writing output to disk
Real systems consider these factors
Costs depends on the main memory buffer size Reduce the need for disk access
Depends on other concurrent OS processes
Hard to determine ahead of actual execution
Often use worst case estimates
©Silberschatz, Korth and Sudarshan13.8Database System Concepts
Selection OperationSelection Operation
File scan Search algorithms to locate and retrieve records that fulfill a
selection condition
Algorithm A1 (linear search).
Cost estimate (number of disk blocks scanned) = br
br : number of blocks containing records of relation r
If selection is on a key attribute, cost = (br /2)
stop on finding record
Linear search can be applied regardless of
selection condition or
ordering of records in the file, or
availability of indices
©Silberschatz, Korth and Sudarshan13.9Database System Concepts
Selection Operation (Cont.)Selection Operation (Cont.)
A2 (binary search) Applicable if selection is an equality comparison on the attribute
on which file is ordered
Assume that the blocks of a relation are stored contiguously
Cost estimate (number of disk blocks to be scanned):
log2(br) : cost to locate the first tuple
+ number of blocks containing records that satisfy selection condition
©Silberschatz, Korth and Sudarshan13.10Database System Concepts
Selections Using IndicesSelections Using Indices Index scan – search algorithms that use an index
selection condition must be on search-key of index.
A3 (primary index on candidate key, equality).
Cost = Hti (height of B+ tree) + 1 (retrieve a signle record)
A4 (primary index on nonkey, equality) Records will be on consecutive blocks
Cost = HTi + number of blocks containing retrieved records
A5 (equality on search-key of secondary index). Retrieve a single record if the search-key is a candidate key
Cost = HTi + 1
Retrieve multiple records if search-key is not a candidate key
Cost = HTi + number of records retrieved
– Can be very expensive!
– Each record may be on a different block (a lot of I/O)
©Silberschatz, Korth and Sudarshan13.11Database System Concepts
Selections Involving ComparisonsSelections Involving Comparisons Selections of the form AV (r) or A V(r) by using
a linear file scan or binary search, or indices in the following ways:
A6 (primary index, comparison). (Relation is sorted on A) For A V (r) use index to find first tuple v and scan relation sequentially
from there
For AV (r) just scan relation sequentially till first tuple > v; do not use index
A7 (secondary index, comparison). For A V (r), use index to find first index entry v and scan index
sequentially from there, to find pointers to records.
For AV (r), just scan leaf pages of index finding pointers to records, till first entry > v
In either case, retrieve records that are pointed to
– requires an I/O for each record
– Linear file scan may be cheaper if many records are to be fetched!
©Silberschatz, Korth and Sudarshan13.12Database System Concepts
Implementation of Complex SelectionsImplementation of Complex Selections
Conjunction: 1 2. . . n(r)
A8 (conjunctive selection using one index).
Choose i and algorithms A1 through A7 that results in the least cost for i (r)
Test other conditions tuple after fetching tuples into memory buffer
A9 (conjunctive selection using multiple-key index). Use appropriate composite (multiple-key) index if available
A10 (conjunctive selection by intersection of identifiers) Obtain pointers to records satisfying each individual condition Take intersection of all the obtained sets of record pointers Fetch records from file Apply test in memory, if some conditions do not have appropriate
indices
©Silberschatz, Korth and Sudarshan13.13Database System Concepts
Algorithms for Complex SelectionsAlgorithms for Complex Selections
Disjunction:1 2 . . . n (r).
A11 (disjunctive selection by union of identifiers). Applicable if all conditions have available indices.
Otherwise use linear scan.
Use corresponding index for each condition, and take union of all the obtained sets of record pointers.
Fetch records from file
©Silberschatz, Korth and Sudarshan13.14Database System Concepts
SortingSorting
Why important? Users may require sorted output
Join can be performed efficiently
Logical ordering Build an index on the sort key
Expensive (many I/O operations)
Physically order records
Sorting algorithms In memory algorithms, e.g., quicksort, if relations fit in the memory
Otherwise, external sorting algorithms such as external sort-merge
©Silberschatz, Korth and Sudarshan13.15Database System Concepts
External Sort-MergeExternal Sort-Merge
1. Create sorted runs 1. Let M = #pages in main memory buffer
2. i = 0 repeat Read M blocks of relation into memory; Sort the in-memory blocks; Write sorted data to run Ri ;
3. i++;
4. util the end of the realtion
5. /* Let the final value of i = N */
©Silberschatz, Korth and Sudarshan13.16Database System Concepts
External Sort-Merge (cont’d)External Sort-Merge (cont’d)
Merge the runs (N-way merge) Assume that N < M Use N memory blocks to buffer input runs, and 1 block to buffer
output. Read the first block of each run into its buffer page repeat
Select the first record (in sort order) among all buffer pages; Write the record to the output buffer. If the output buffer is full write it to
disk; Delete the record from its input buffer page;
If the buffer page becomes empty read the next block (if any) of the run into the buffer;
until all input buffer pages are empty
©Silberschatz, Korth and Sudarshan13.17Database System Concepts
Example: External Sorting Using Sort-MergeExample: External Sorting Using Sort-Merge
©Silberschatz, Korth and Sudarshan13.18Database System Concepts
External Sort-Merge (Cont.)External Sort-Merge (Cont.)
If i M, several merge passes are required. In each pass, contiguous groups of M - 1 runs are
merged
Create runs longer by the same factor
E.g. M=11, #runs = 90
After one pass
– the number of runs reduces to 9
– each run is 10 times the size of the initial runs
Repeat util all runs have been merged into one
©Silberschatz, Korth and Sudarshan13.19Database System Concepts
External Merge Sort (Cont.)External Merge Sort (Cont.)
Cost analysis
Total number of merge passes required: logM–1(br/M)
#initial disk accesses is 2br
#disk accesses in each pass is 2br
Total number of disk accesses for external sorting is
br ( 2 logM–1(br / M) + 1)
©Silberschatz, Korth and Sudarshan13.20Database System Concepts
Join OperationJoin Operation
Several different algorithms to implement joins Nested-loop join
Block nested-loop join
Indexed nested-loop join
Merge-join
Hash-join
Choice based on cost estimate
Examples use the following information Number of records of customer: 10,000 depositor: 5000
Number of blocks of customer: 400 depositor: 100
©Silberschatz, Korth and Sudarshan13.21Database System Concepts
Nested-Loop JoinNested-Loop Join
To compute r sfor each tuple tr in r
for each tuple ts in stest pair (tr,ts) to see if they satisfy the join condition if they do, add tr • ts to the result.
endend
r : outer relation
s: inner relation of the join
Requires no indices and can be used with any kind of join condition
Expensive since it examines every pair of tuples in the two relations
©Silberschatz, Korth and Sudarshan13.22Database System Concepts
Nested-Loop Join (Cont.)Nested-Loop Join (Cont.) In the worst case, if there is enough memory only to hold
one block of each relation, the estimated cost is
nr bs + br disk accesses.
If a smaller relation fits entirely in memory, use it as the inner relation. Reduces cost to br + bs disk accesses.
Assuming worst case memory availability cost estimate is 5000 400 + 100 = 2,000,100 disk accesses with depositor as
outer relation, and 1000 100 + 400 = 1,000,400 disk accesses with customer as
the outer relation.
If a smaller relation (depositor) fits entirely in memory, the cost estimate will be 500 disk accesses.
Block nested-loops algorithm (next slide) shows better performance
©Silberschatz, Korth and Sudarshan13.23Database System Concepts
Block Nested-Loop JoinBlock Nested-Loop Join
Variant of nested-loop join in which every block of inner relation is paired with every block of outer relation.
for each block Br of r do begin
for each block Bs of s do begin
for each tuple tr in Br do begin
for each tuple ts in Bs do begin
Check if (tr,ts) satisfy the join condition
if they do, add tr • ts to the result.
endend
endend
©Silberschatz, Korth and Sudarshan13.24Database System Concepts
Block Nested-Loop Join (Cont.)Block Nested-Loop Join (Cont.)
Worst case estimate: br bs + br block accesses. Each block in the inner relation s is read once for each block in the
outer relation (instead of once for each tuple in the outer relation)
Best case: br + bs block accesses.
Improvements to nested loop and block nested loop algorithms: In block nested-loop, use M - 2 disk blocks for outer relations,
where M = memory size in blocks; use remaining two blocks to buffer inner relation and output
Cost = br / (M-2) bs + br If equi-join attribute forms a key or inner relation, stop inner loop
on first match Scan inner loop forward and backward alternately, to make use of
the blocks remaining in buffer (with LRU replacement) Use index on inner relation if available (next slide)
©Silberschatz, Korth and Sudarshan13.25Database System Concepts
Indexed Nested-Loop JoinIndexed Nested-Loop Join Index lookups can replace file scans if
join is an equi-join or natural join and index is available on the inner relation’s join attribute
Can construct an index just to compute a join.
For each tuple tr in the outer relation r, use the index to look up tuples in s that satisfy the join condition with tuple tr
Cost of the join: br + nr c Where c is the cost of traversing index and fetching all matching s
tuples for one tuple of r c can be estimated as cost of a single selection on s using the join
condition.
If indices are available on join attributes of both r and s,use the relation with fewer tuples as the outer relation.
©Silberschatz, Korth and Sudarshan13.26Database System Concepts
Example of Nested-Loop Join CostsExample of Nested-Loop Join Costs
Compute depositor customer, with depositor as the outer relation.
Let customer have a primary B+-tree index on the join attribute customer-name, which contains 20 entries in each index node.
Since customer has 10,000 tuples, the height of the tree is 4, and one more access is needed to find the actual data
depositor has 5000 tuples
Cost of block nested loops join 400*100 + 100 = 40,100 disk accesses assuming worst case
memory (may be significantly less with more memory)
Cost of indexed nested loops join
100 + 5000 * 5 = 25,100 disk accesses.
CPU cost likely to be less than that for block nested loops join
©Silberschatz, Korth and Sudarshan13.27Database System Concepts
Merge-JoinMerge-Join
1. Sort both relations on their join attribute (if not already sorted on the join attributes).
2. Merge the sorted relations to join them
1. Join step is similar to the merge stage of the sort-merge algorithm.
2. Main difference is handling of duplicate values in join attribute — every pair with same value on join attribute must be matched
©Silberschatz, Korth and Sudarshan13.28Database System Concepts
Merge-Join (Cont.)Merge-Join (Cont.)
Can be used only for equi-joins and natural joins
Each block needs to be read only once, assuming all tuples for any given value of the join attributes fit in memory
Thus number of block accesses for merge-join is
br + bs + the cost of sorting if relations are unsorted.
©Silberschatz, Korth and Sudarshan13.29Database System Concepts
Materialization (Cont.)Materialization (Cont.)
Materialized evaluation is always applicable
Cost of writing results to disk and reading them back can be quite high Our cost formulas for operations ignore cost of writing results to
disk, so
Overall cost = Sum of costs of individual operations + cost of writing intermediate results to disk
Double buffering: use two output buffers for each operation, when one is full write it to disk while the other is getting filled Allows overlap of disk writes with computation and reduces
execution time