R-Trees A Dynamic Index

Structure for Spatial Searching

Antonin GuttmanIn Proceedings of the 1984 ACM SIGMOD

international conference on Management of data (SIGMOD '84). ACM, New York, NY, USA

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Introduction R-Tree Index Structure Searching and Updating Performance Tests Conclusion

Outline

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Introduction

Background Previous Works

R-Tree Index Structure Searching and Updating Performance Tests Conclusion

Outline

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Motivation

To deal with spatial data efficiently Traditional database are for one-dimension data

Traditional Index Structure Hash Tables B Trees and ISAM

Background

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Previous Works

Method Disadvantage

Cell methods Not good for dynamic structures

Quad trees Do not take paging of secondary memory into accountK-D tree

K-D-B tree Useful only for point data

Corner Stltchmg

Homogeneous primary memoryNot efficient

Grid files

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Introduction R-Tree Index Structure

R-Tree Index Structure Properties of the R-Tree Example of a R-Tree

Searching and Updating Performance Tests Conclusion

Outline

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What is a R-tree

Height-balanced tree similar to a B-tree No need for doing periodic reorganization

What is the contents in the nodes (I, tuple-identifier) in leaf node (I, child-pointer) in non-leaf node

It must satisfy following properties

R-Tree Index Structure

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Let M be the maximum number of entries that

will fit in one node Let m <= M/2 be a parameter specifying the

minimum number of entries in a node

Properties of the R-Tree

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1. Every leaf node contains between m and M index records

unless it is the root2. For each index record(I, tuple-identifier) in a leaf node, I is

the smallest rectangle that spatially contains the n-dimensional data object represented by the indicated tuple

3. Every non-leaf node has between m and M children unless it is the root

4. For each entry(I, child-pointer) in a non-leaf node, I is the smallest rectangle that spatially contains the rectangles in the child node

5. The root node has at least two children unless it is a leaf6. All leaves appear on the same level

Properties of the R-Tree

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Example of a R-Tree

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Introduction R-Tree Index Structure Searching and Updating

Searching Example of Searching Insertion Updates and Other Operations Node Splitting

Performance Tests Conclusion

Outline

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Problem definition

Give an R-Tree whose root node is T, find all index records whose rectangles overlap a search rectangle S

NotationsEI is the rectangle part of an index entry EEp is the tuple-identifier or child-pointer of an E

Searching

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Search(T, LIST) {

IF (T is not a leaf) FOR EACH (E in T) IF (E.EI overlaps S) Search(E.Ep);ELSE FOR EACH (E in T) IF (E.EI overlaps S) LIST.ADD(E.Ep);

}

Searching

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Example of Searching

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It is similar to insert a record in B-tree that new

record are added to the leaves, nodes that overflow are split, and splits propagate up the tree

Insert(T, E) { L = ChooseLeaf(T, E); INSTALL E; IF (L is full) { LL = SplitNode(L); AdjustTree(L, LL); }}

Insertion

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N ChooseLeaf(T, E) { SET N = T; IF (N is a non-leaf node) { find the F that F.FI needs least enlargement to include E.EI IN N SET N = F.Fp; ChooseLeaf(N, E); } ELSE return N;}

Insertion - ChooseLeaf()

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AdjustTree(L, LL) { SET N = L; SET NN = LL; IF (N is root) // check if done return; SET P = N.parent; SET En to be N’s entry in P ADJUST EnI so that it tightly encloses all entry rectangles in N IF (NN != NULL) { CREATE Enn; // Enn.p = NN, EnnI enclosing all rectangles in NN P.add(Enn); IF (P is full) { PP = SplitNode(P); AdjustTree(P, PP); } }}

Insertion - AdjustTree()

These three lines are for adjust covering rectangle in parent entry

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Remove index record E from an R-tree

Delete(T, E) { L = FindLeaf(T, E); IF (L != NULL) { Remove(E, L); // remove E from L CondenseTree(L); IF (root node has only one child) make the child the new root; }}

Deletion

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Given an R-tree whose root node is T, find the leaf node containing the

index entry E

T FindLeaf(T, E) { IF (T is not a leaf) { FOR EACH (F in T) { IF (FI overlaps EI) { T = FindLeaf(Fp, E); } } } IF (T is leaf) { FOR EACH (F in T) IF (F MATCH E) return T; }}

Deletion - FindLeaf()

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CondenseTree(L) {CT1: SET N = L; SET Q = empty; // the set of eliminated nodes.CT2: IF (N is root) { FOR EACH (E in Q) Insert(T, E); } ELSE { SET P = N.parent; SET En to be N’s entry in P;CT3: IF (N has fewer than m entries) { DELETE (En, P) // delete En from P Q.add(N); } ELSE {CT4: adjust EnI to tightly contain all entries in N;CT5: SET N = P; GOTO CT2; } }}

Deletion - CondenseTree()

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Update

Just perform deletion and re-insertion to do update

Other operations To find all data objects completely contained in

a search area, or all objects that contain a search area

Range deletion

Updates and Other Operations

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We need to perform node splitting when we

insert an entry into a full node The two covering rectangles after a split

should be minimized because it affect efficiency seriously

The are three different kind of splitting algorithms: exhaustive algorithm, quadratic-cost algorithm and linear-cost algoritym

Node Splitting

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It is the most straightforward approach To generate all possible groupings and choose

the best It most disadvantage is the high time

complexity, and reasonable value of M is 200(4096/4/(4+1))

Node Splitting- Exhaustive Algorithm

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It attempts to find a small-area split, but is not

guaranteed to find one with the smallest area possible

The cost is quadratic in M and linear in the number of dimensions

Process1. Pick first entry for each group2. Check if done3. Select entry to assign

Node Splitting - Quadratic-Cost

Algorithm

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Select two entries to be the first elements of the

groups Process

1. Calculate inefficiency of grouping entries together

2. Choose the most wasteful pair

Quadratic-Cost Algorithm PickSeeds()

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Select one remaining entry for classification in

a group Process

1. Determine cost of putting each entry in each group

2. Find entry with greatest preference for one group

Quadratic-Cost Algorithm PickNext()

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It is linear in M and in the number of

dimensions It is identical to Quadratic Split but used a

different version of PickSeed, PickNext Process

1. Find extreme rectangles along all dimensions2. Adjust for shape of the rectangle cluster3. Select the most extreme pair

Node Splitting – Linear-Cost Algorithm

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Introduction R-Tree Index Structure Searching and Updating Performance Tests

Performance Tests CPU Cost of Inserting Records CPU Cost of Deleting Records Search Performance Pages Touched Search Performance CPU Cost Space Efficiency

Second Series of Tests CPU Cost of Inserts and Deletes vs. Amount of Data Search Performance vs. Amount of Data Pages Touched Search Performance vs. Amount of Data CPU Cost Space Required for R-Tree vs. Amount of Data

Conclusion

Outline

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Implemented R-trees in C under Unix on a Vax

11/780 computer It purpose is to choose values for M and m, and

to evaluate different node-splitting algorithms Five page sizes were tested, corresponding to

different values of M Values tested for m were

M/2, M/3 and 2 All tests used

two-dimensional data

Performance Tests

Bytes per Page

Max Entries per Page(M)

128 6

256 12

512 25

1024 50

2048 102

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CPU Cost of Inserting Records

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CPU Cost of Deleting Records

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Search Performance Pages Touched

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Search Performance CPU Cost

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Space Efficiency

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It measured T-tree performance as a function

of the amount of data in the index The same sequence of test operations as

before was run on samples containing 1057, 2238, 3295, and 4559 rectangles

Parameters Linear algorithm with m = 2 Quadratic algorithm with m = M/3 Both with a page size of 1024 bytes(M=50)

Second Series of Tests

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CPU Cost of Inserts and Deletes vs. Amount of Data

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Search Performance vs. Amount of Data Pages

Touched

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Search Performance vs.Amount of Data CPU

Cost

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Space Required for R-Tree vs. Amount of Data

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Introduction R-Tree Index Structure Searching and Updating Performance Tests Conclusion

Outline

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Author proposed an useful index structure,

named R-tree, for multi-dimensional data Author also gave tree different splitting

algorithm, ran some tests on it, and concluded that linear node-split algorithm is the most efficient approach

R-tree would be easy to add to any relational database system

Conclusion