Intersection Graphs and Geometric Objects in the Plane
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Mutant Knots and Intersection Graphs 1 Introduction
Mutant knots and intersection graphs S. V. CHMUTOV S. K. LANDO We prove that if a finite order knot invariant does not distinguish mutant knots, then the corresponding weight system depends on the intersection graph of a chord diagram rather than on the diagram itself. Conversely, if we have a weight system depending only on the intersection graphs of chord diagrams, then the composition of such a weight system with the Kontsevich invariant determines a knot invariant that does not distinguish mutant knots. Thus, an equivalence between finite order invariants not distinguishing mutants and weight systems depending on intersections graphs only is established. We discuss relationship between our results and certain Lie algebra weight systems. 57M15; 57M25 1 Introduction Below, we use standard notions of the theory of finite order, or Vassiliev, invariants of knots in 3-space; their definitions can be found, for example, in [6] or [14], and we recall them briefly in Section 2. All knots are assumed to be oriented. Two knots are said to be mutant if they differ by a rotation of a tangle with four endpoints about either a vertical axis, or a horizontal axis, or an axis perpendicular to the paper. If necessary, the orientation inside the tangle may be replaced by the opposite one. Here is a famous example of mutant knots, the Conway (11n34) knot C of genus 3, and Kinoshita–Terasaka (11n42) knot KT of genus 2 (see [1]). C = KT = Note that the change of the orientation of a knot can be achieved by a mutation in the complement to a trivial tangle. -
Geometric Algorithms for Optimal Airspace Design and Air Traffic
Geometric Algorithms for Optimal Airspace Design and Air Traffic Controller Workload Balancing AMITABH BASU Carnegie Mellon University JOSEPH S. B. MITCHELL Stony Brook University and GIRISHKUMAR SABHNANI Stony Brook University The National Airspace System (NAS) is designed to accommodate a large number of flights over North America. For purposes of workload limitations for air traffic controllers, the airspace is partitioned into approximately 600 sectors; each sector is observed by one or more controllers. In order to satisfy workload limitations for controllers, it is important that sectors be designed carefully according to the traffic patterns of flights, so that no sector becomes overloaded. We formulate and study the airspace sectorization problem from an algorithmic point of view, model- ing the problem of optimal sectorization as a geometric partition problem with constraints. The novelty of the problem is that it partitions data consisting of trajectories of moving points, rather than static point set partitioning that is commonly studied. First, we formulate and solve the 1D version of the problem, showing how to partition a line into “sectors” (intervals) according to historical trajectory data. Then, we apply the 1D solution framework to design a 2D sectoriza- tion heuristic based on binary space partitions. We also devise partitions based on balanced “pie partitions” of a convex polygon. We evaluate our 2D algorithms experimentally, applying our algorithms to actual historical flight track data for the NAS. We compare the workload balance of our methods to that of the existing set of sectors for the NAS and find that our resectorization yields competitive and improved workload balancing. -
Coloring Copoints of a Planar Point Set
Coloring Copoints of a Planar Point Set Walter Morris Department of Mathematical Sciences George Mason University 4400 University Drive, Fairfax, VA 22030, USA Abstract To a set of n points in the plane, one can associate a graph that has less than n2 vertices and has the property that k-cliques in the graph correspond vertex sets of convex k-gons in the point set. We prove an upper bound of 2k¡1 on the size of a planar point set for which the graph has chromatic number k, matching the bound con- jectured by Szekeres for the clique number. Constructions of Erd}os and Szekeres are shown to yield graphs that have very low chromatic number. The constructions are carried out in the context of pseudoline arrangements. 1 Introduction Let X be a ¯nite set of points in IR2. We will assume that X is in general position, that is, no three points of X are on a line. A subset C of X is called closed if C = K \ X for some convex subset K of IR2. The set C of closed subsets of X, partially ordered by inclusion, is a lattice. If x 2 X and A is a closed subset of X that does not contain x and is inclusion-maximal among all closed subsets of X that do not contain x, then A is called a copoint of X attached to x. In the more general context of antimatroids, or convex geometries, co- points have been studied in [1], [2] and [3]. It is shown in these references that every copoint is attached to a unique point of X, and that the copoints are the meet-irreducible elements of the lattice of closed sets. -
30 ARRANGEMENTS Dan Halperin and Micha Sharir
30 ARRANGEMENTS Dan Halperin and Micha Sharir INTRODUCTION Given a finite collection of geometric objects such as hyperplanes or spheres in Rd, the arrangement ( S) is the decomposition of Rd into connected open cells of dimensions 0, 1,...,d AinducedS by . Besides being interesting in their own right, ar- rangements of hyperplanes have servedS as a unifying structure for many problems in discrete and computational geometry. With the recent advances in the study of arrangements of curved (algebraic) surfaces, arrangements have emerged as the underlying structure of geometric problems in a variety of “physical world” applica- tion domains such as robot motion planning and computer vision. This chapter is devoted to arrangements of hyperplanes and of curved surfaces in low-dimensional Euclidean space, with an emphasis on combinatorics and algorithms. In the first section we introduce basic terminology and combinatorics of ar- rangements. In Section 30.2 we describe substructures in arrangements and their combinatorial complexity. Section 30.3 deals with data structures for representing arrangements and with special refinements of arrangements. The following two sections focus on algorithms: algorithms for constructing full arrangements are described in Section 30.4, and algorithms for constructing substructures in Sec- tion 30.5. In Section 30.6 we discuss the relation between arrangements and other structures. Several applications of arrangements are reviewed in Section 30.7. Sec- tion 30.8 deals with robustness issues when implementing algorithms and data structures for arrangements and Section 30.9 surveys software implementations. We conclude in Section 30.10 with a brief review of Davenport-Schinzel sequences, a combinatorial structure that plays an important role in the analysis of arrange- ments. -
Arrangements of Approaching Pseudo-Lines
Arrangements of Approaching Pseudo-Lines Stefan Felsner∗1, Alexander Pilzy2, and Patrick Schnider3 1Institut f¨urMathematik, Technische Universit¨atBerlin, [email protected] 2Institute of SoftwareTechnology, Graz University of Technology, Austria, [email protected] 3Department of Computer Science, ETH Z¨urich, Switzerland, [email protected] January 24, 2020 Abstract We consider arrangements of n pseudo-lines in the Euclidean plane where each pseudo-line `i is represented by a bi-infinite connected x-monotone curve fi(x), x 2 R, s.t. for any two pseudo-lines `i and `j with i < j, the function x 7! fj (x) − fi(x) is monotonically decreasing and surjective (i.e., the pseudo-lines approach each other until they cross, and then move away from each other). We show that such arrangements of approaching pseudo-lines, under some aspects, behave similar to arrangements of lines, while for other aspects, they share the freedom of general pseudo-line arrangements. For the former, we prove: • There are arrangements of pseudo-lines that are not realizable with approaching pseudo-lines. • Every arrangement of approaching pseudo-lines has a dual generalized configura- tion of points with an underlying arrangement of approaching pseudo-lines. For the latter, we show: 2 • There are 2Θ(n ) isomorphism classes of arrangements of approaching pseudo-lines (while there are only 2Θ(n log n) isomorphism classes of line arrangements). • It can be decided in polynomial time whether an allowable sequence is realizable by an arrangement of approaching pseudo-lines. Furthermore, arrangements of approaching pseudo-lines can be transformed into each arXiv:2001.08419v1 [cs.CG] 23 Jan 2020 other by flipping triangular cells, i.e., they have a connected flip graph, and every bichromatic arrangement of this type contains a bichromatic triangular cell. -
Final Report (Sections B and C)
EuroGIGA Final report (Sections B and C) Deadline: 01/12/2014 Section B. Progress report B1. CRP progress and scientific highlights (max. 1500 words) 1. The collaborative work (c.400‐750 words) a. With reference to the CRP objectives and work plan, describe the work undertaken by the CRP and the contribution of each Individual Project to the collaboration in terms of its specific expertise and tasks/responsibilities. How closely did the partners work together? The work plan was divided into 13 work‐packages, each being supervised by one IP (some IPs were responsible for more work‐packages, these were those whose teams consisted of more sites – IP1‐CZ was responsible for WP01 (Prague) and WP08 (Brno) and IP2‐DE was responsible for WP02 (Wurzburg), WP10 (Berlin), WP11 (Dortmund) and WP12 (Tubingen)). The original work plan from the project proposal contained only 12 work‐packages, the last one was added during the life of the project when a new AP4 (Munster) was added. All teams responsible for particular work‐packages actively worked in their areas of proposed research, achieved many new results and published many scientific papers. But most importantly, mainly as a result of extensive networking activities, researchers from all IPs and APs actively collaborated and achieved results for different work‐packages. For instance, WP01 received contributions from IP1‐CZ, IP2‐DE, IP5‐PL and AP1‐IT, WP03 received contributions from IP2‐DE, IP3‐CH, AP1‐IT and AP3‐DE, and WP07 received contributions from IP1‐CZ, IP2‐DE, IP3‐CH and AP2‐NL. Each Individual Project contributed to at least two work‐packages. -
Arrangements of Approaching Pseudo-Lines
1 Arrangements of Approaching Pseudo-Lines ∗1 †2 3 2 Stefan Felsner , Alexander Pilz , and Patrick Schnider 1 3 Institut f¨urMathematik, Technische Universit¨atBerlin, 4 [email protected] 2 5 Institute of SoftwareTechnology, Graz University of Technology, Austria, 6 [email protected] 3 7 Department of Computer Science, ETH Z¨urich, Switzerland, 8 [email protected] 9 August 23, 2020 10 Abstract 11 We consider arrangements of n pseudo-lines in the Euclidean plane where each 12 pseudo-line `i is represented by a bi-infinite connected x-monotone curve fi(x), x 2 R, 13 such that for any two pseudo-lines `i and `j with i < j, the function x 7! fj (x)−fi(x) is 14 monotonically decreasing and surjective (i.e., the pseudo-lines approach each other until 15 they cross, and then move away from each other). We show that such arrangements of 16 approaching pseudo-lines, under some aspects, behave similar to arrangements of lines, 17 while for other aspects, they share the freedom of general pseudo-line arrangements. 18 For the former, we prove: 19 • There are arrangements of pseudo-lines that are not realizable with approaching 20 pseudo-lines. 21 • Every arrangement of approaching pseudo-lines has a dual generalized configura- 22 tion of points with an underlying arrangement of approaching pseudo-lines. 23 For the latter, we show: Θ(n2) 24 • There are 2 isomorphism classes of arrangements of approaching pseudo-lines Θ(n log n) 25 (while there are only 2 isomorphism classes of line arrangements). -
Lipics-Socg-2017-9.Pdf (0.9
A Universal Slope Set for 1-Bend Planar Drawings Patrizio Angelini1, Michael A. Bekos2, Giuseppe Liotta3, and Fabrizio Montecchiani4 1 Wilhelm-Schickhard-Institut für Informatik, Universität Tübingen, Tübingen, Germany [email protected] 2 Wilhelm-Schickhard-Institut für Informatik, Universität Tübingen, Tübingen, Germany [email protected] 3 Universitá degli Studi di Perugia, Perugia, Italy [email protected] 4 Universitá degli Studi di Perugia, Perugia, Italy [email protected] Abstract We describe a set of ∆−1 slopes that are universal for 1-bend planar drawings of planar graphs of maximum degree ∆ ≥ 4; this establishes a new upper bound of ∆ − 1 on the 1-bend planar slope number. By universal we mean that every planar graph of degree ∆ has a planar drawing with at most one bend per edge and such that the slopes of the segments forming the edges belong to the given set of slopes. This improves over previous results in two ways: Firstly, the best previously 3 known upper bound for the 1-bend planar slope number was 2 (∆ − 1) (the known lower bound 3 being 4 (∆ − 1)); secondly, all the known algorithms to construct 1-bend planar drawings with O(∆) slopes use a different set of slopes for each graph and can have bad angular resolution, while our algorithm uses a universal set of slopes, which also guarantees that the minimum angle π between any two edges incident to a vertex is (∆−1) . 1998 ACM Subject Classification G.2.1 Combinatorics, G.2.2 Graph Theory Keywords and phrases Slope number, 1-bend drawings, planar graphs, angular resolution Digital Object Identifier 10.4230/LIPIcs.SoCG.2017.9 1 Introduction This paper is concerned with planar drawings of graphs such that each edge is a poly-line with few bends, each segment has one of a limited set of possible slopes, and the drawing has good angular resolution, i.e. -
Visualizing Graphs: Optimization and Trade-Offs
Visualizing Graphs: Optimization and Trade-offs by Debajyoti Mondal A Thesis submitted to the Faculty of Graduate Studies of The University of Manitoba in partial fulfilment of the requirements of the degree of DOCTOR OF PHILOSOPHY Department of Computer Science University of Manitoba Winnipeg Copyright c 2016 by Debajyoti Mondal Thesis advisor Author Dr. Stephane Durocher Debajyoti Mondal Abstract Effective visualization of graphs is a powerful tool to help understand the rela- tionships among the graph’s underlying objects and to interact with them. Sev- eral styles for drawing graphs have emerged over the last three decades. Polyline drawing is a widely used style for drawing graphs, where each node is mapped to a distinct point in the plane and each edge is mapped to a polygonal chain between their corresponding nodes. Some common optimization criteria for such a drawing are defined in terms of area requirement, number of bends per edge, angular resolution, number of distinct line segments, edge crossings, and number of planar layers. In this thesis we develop algorithms for drawing graphs that optimize different aesthetic qualities of the drawing. Our algorithms seek to simultaneously opti- mize multiple drawing aesthetics, reveal potential trade-offs among them, and improve many previous graph drawing algorithms. We start by exploring probable trade-offs in the context of planar graphs. We prove that every n-vertex planar triangulation G with maximum degree D can be drawn with at most 2n + t 3 segments and O(8t D2t) area, where t is the − · number of leaves in a Schnyder tree of G. -
BOOK EMBEDDINGS of LAMAN GRAPHS 1. Definitions Definition 1
BOOK EMBEDDINGS OF LAMAN GRAPHS MICHELLE DELCOURT, MEGHAN GALIARDI, AND JORDAN TIRRELL Abstract. We explore various techniques to embed planar Laman graphs in books. These graphs can be embedded as pointed pseudo-triangulations and have many interesting properties. We conjecture that all planar Laman graphs can be embedded in two pages. 1. Definitions Definition 1. A graph G with n vertices and m edges is a Laman graph if m = 2n − 3 and every subgraph induced by k vertices (where k > 1) contains at most 2k − 3 edges. Definition 2. A book embedding of a graph G is a drawing with no crossings of G on a book; every edge is mapped to a page (a half-plane), and every vertex is mapped to the spine (the boundary shared by all the half-planes). Definition 3. The book thickness of a graph G, denoted bt(G) also known as page number, is the minimum number of pages needed to book embed G. 2. Finding Book Thickness Using Henneberg Constructions Motivated by Schnyder labelings for triangulations, Huemer and Kappes proposed an analogous binary labeling for quadrangulations which decom- poses the edge set in two directed trees rooted at a sink. A weak version of this labeling is valid for Laman graphs; however, the labeling does not guarantee a decomposition into two trees. The binary labeling of Laman graphs of Huemer and Kappes is based on Henneberg constructions. The Henneberg construction provides a decomposition into two trees whereas the labeling does not. A Henneberg construction consists of two moves: I. Adding a vertex of degree two II. -
Representations of Edge Intersection Graphs of Paths in a Tree Martin Charles Golumbic, Marina Lipshteyn, Michal Stern
Representations of Edge Intersection Graphs of Paths in a Tree Martin Charles Golumbic, Marina Lipshteyn, Michal Stern To cite this version: Martin Charles Golumbic, Marina Lipshteyn, Michal Stern. Representations of Edge Intersection Graphs of Paths in a Tree. 2005 European Conference on Combinatorics, Graph Theory and Appli- cations (EuroComb ’05), 2005, Berlin, Germany. pp.87-92. hal-01184396 HAL Id: hal-01184396 https://hal.inria.fr/hal-01184396 Submitted on 14 Aug 2015 HAL is a multi-disciplinary open access L’archive ouverte pluridisciplinaire HAL, est archive for the deposit and dissemination of sci- destinée au dépôt et à la diffusion de documents entific research documents, whether they are pub- scientifiques de niveau recherche, publiés ou non, lished or not. The documents may come from émanant des établissements d’enseignement et de teaching and research institutions in France or recherche français ou étrangers, des laboratoires abroad, or from public or private research centers. publics ou privés. EuroComb 2005 DMTCS proc. AE, 2005, 87–92 Representations of Edge Intersection Graphs of Paths in a Tree Martin Charles Golumbic1,† Marina Lipshteyn1 and Michal Stern1 1Caesarea Rothschild Institute, University of Haifa, Haifa, Israel Let P be a collection of nontrivial simple paths in a tree T . The edge intersection graph of P, denoted by EP T (P), has vertex set that corresponds to the members of P, and two vertices are joined by an edge if the corresponding members of P share a common edge in T . An undirected graph G is called an edge intersection graph of paths in a tree, if G = EP T (P) for some P and T . -
NP-Complete and Cliques
CSC373— Algorithm Design, Analysis, and Complexity — Spring 2018 Tutorial Exercise 10: Cliques and Intersection Graphs for Intervals 1. Clique. Given an undirected graph G = (V,E) a clique (pronounced “cleek” in Canadian, heh?) is a subset of vertices K ⊆ V such that, for every pair of distinct vertices u,v ∈ K, the edge (u,v) is in E. See Clique, Graph Theory, Wikipedia. A second concept that will be useful is the notion of a complement graph Gc. We say Gc is the complement (graph) of G = (V,E) iff Gc = (V,Ec), where Ec = {(u,v) | u,v ∈ V,u 6= v, and (u,v) ∈/ E} (see Complement Graph, Wikipedia). That is, the complement graph Gc is the graph over the same set of vertices, but it contains all (and only) the edges that are not in E. Finally, a clique K ⊂ V of G =(V,E) is said to be a maximal clique iff there is no superset W such that K ⊂ W ⊆ V and W is a clique of G. Consider the decision problem: Clique: Given an undirected graph and an integer k, does there exist a clique K of G with |K|≥ k? Clearly, Clique is in NP. We wish to show that Clique is NP-complete. To do this, it is convenient to first note that the independent set problem IndepSet(G, k) is very closely related to the Clique problem for the complement graph, i.e., Clique(Gc,k). Use this strategy to show: IndepSet ≡p Clique. (1) 2. Consider the interval scheduling problem we started this course with (which is also revisited in Assignment 3, Question 1).