I/O and Space-Efficient Path Traversal in Planar Graphs Craig Dillabaugh, Carleton University Meng He, University of Waterloo Anil Maheshwari, Carleton University Norbert Zeh, Dalhousie University

Background: Succinct Data Structures  What are succinct data structures (Jacobson 1989) Representing data structures using ideally information-theoretic minimum space Supporting efficient navigational operations  Why succinct data structures Large data sets in modern applications: textual, genomic, spatial or geometric

Background: External Memory Model  Parameters N: number of elements in the problem instance M: size of the internal memory B: size of a disk block  Cost: number of I/O’s (block transfers) between internal memory and external memory Aggarwal and Vitter 1988 CPU Internal Memory Block External Memory

Our Contributions  Our goal is to design data structures that are both succinct and efficient in the External Memory setting  Our results A succinct representation of bounded-degree planar graphs that supports I/O-efficient path traversal A succinct representation of triangulated terrains that supports various geometric queries

Notation  N: number of vertices of the given graph G  d: maximum degree of vertices  q: number of bits required to encode the key of each vertex  K: the length of the path

Two-Level Partition  A tool: graph separator (Frederickson 1987) Size of each subgraph (region): r Number of regions: Θ(N/r) Number of boundary vertices: O(N/(r 1/2 ))  Two-level partition Subdivide G into regions of fixed maximum size Subdivide each region into sub-regions of smaller fixed maximum size  Types of vertices for each region / subregion Interior vertices Boundary vertices

α-Neighbourhood  Definition Beginning with a given vertex v, we perform a breadth-first search in G and select the first α vertices encountered The α-neighbourhood of v is the subgraph of G induced by these vertices Internal and terminal vertices  Property: The distance between v and any terminal vertex in its α- neighbourhood is at least log d α  In our representation, we store α-neighbourhood of each boundary vertex. If a sub-region boundary vertex is interior to a region, we add an additional constraint that its α-neighbourhood cannot be extended beyond the region

Overview of Labeling Scheme  Labels at three levels for the same vertex Graph-label (unique) Region-label (one or more) Subregion-label (one or more)  Assign the labels for bottom up

Sub-Region Labels  Encoding subregion R i,j using any succinct representation for planar graphs  This induces a permutation of the vertices in R i,j  Subregion-label: the k th vertex in the above permutation has subregion-label k in R i,j

Region-Labels and Graph-Labels 1, 2, 3, 4, 5, 61, 2, 3, 4, 51, 2, 3, 4, 5, 6, 7 R 1,1 R 1,2 R 1,3 R1R1 1, 2, 3, 4, 5, 6 7, 8, 9, 10, 11, 12,13,14,15 … The assignment of graph-labels are similar Succinct structures of o(n) bits are constructed to support conversion between labels at different levels in O(1) I/O’s

Data Structures  Denote by A the maximum number of vertices that may be stored in a block, and this is our maximum sub-region size  Choose Alg 3 N to be the maximum size of each region  We only encode sub-regions and α-neighbourhoods of boundary vertices as components  Encode the graph structure of each component in a succinct fashion  Information is encoded so that we can retrieve the graph labels of the internal vertices in an α-neighbourhood without requiring additional I/O’s

Space Analysis  We assume B = Ω(lg N)  A = (B lg N) / (c + q) c: number of bits per vertex required to the sub-graph structure and boundary bit vector  Choose α = A 1/3  Intuitively, our structures are space-efficient because: Region boundary vertices are few enough, so that information such as the graph labels of the vertices in their α- neighbourhoods do not occupy too much space The number of sub-region boundary vertices is larger, but information such as region-labels uses fewer bits (lg (Alg 3 N))  Total space: O(N) + Nq + o(Nq) bits

Traversal Algorithm  Load either a sub-region or the α-neighbourhood of a boundary vertex  Traverse the above component until a boundary/terminal vertex is encountered  Load the next component from external memory and traversal continues

I/O Efficiency  Observations When encountering a terminal/boundary vertex, the next component can be loaded in O(1) I/O’s Given a component, the graph labels of all interior/internal vertices can be reported without incurring any additional I/O’s By loading a constant number of components, we can visit Ω(lg B) vertices along the path  I/O complexity: O(K / lg B)

Main Result  A succinct representation of bounded- degree planar graph: Space: O(N) + Nq + o(Nq) bits I/O complexity for path traversal: O(K / lg B)

Terrains Modeled as Triangular- Irregular Network  Notation N: number of points Φ: number of bits required to store the coordinates of each point  Space: NΦ + O(N) + o(NΦ) bits  I/O complexity: Reporting a path crossing K faces: O(K / lg B)

Queries on Triangulated Terrains  Point location: O(log B N) I/O’s  Terrain profile: O(K / lg B) I/O’s  Trickle path: O(K / lg B) I/O’s  Connected component O(K / lg B) I/O’s if the component is convex Can be generalized to components that are not convex, though the result is more complex

Conclusions  We designed a succinct representation of bounded-degree planar graphs that supports I/O-efficient path traversal, and applied this to terrains modeled as TIN to support queries  This provides solutions to modern applications that process very large data  Future work: combining succinct data structures and external memory data structures for other problems

Thank you!