16373684
Counting triangle crossings and halving planes
Every collection of t ≥ 2n<supscrpt>2</supscrpt> triangles witha total of n vertices in <inline-equation><f><blkbd>R</blkbd><sup>3</sup></f></inline-equation> has <inline-equation><f><g>W</g><fen lp="par"><fr><nu>t<sup>4</sup></nu><de>n<sup>6</sup></de></fr><rp post="par"></fen></f></inline-equation> crossing pairs. This implies that one of their edgesmeets<inline-equation><f><g>W</g><fen lp="par"><fr><nu>t<sup>3</sup></nu><de>n<sup>6</sup></de></fr><rp post="par"></fen></f><?Pub Caret></inline-equation> of the triangles. From this it followsthat n points in <inline-equation><f><blkbd>R</blkbd><sup>3</sup></f></inline-equation> have only O(n<supscrpt>8/3</supscrpt>) halvingplanes.
12111408
Cutting dense point sets in half
A <italic>halving hyperplane</italic> of a set <italic>S</italic> of <italic>n</italic> points in <bold>R</bold><supscrpt><italic>d</italic></supscrpt> contains <italic>d</italic> affinely independent points of <italic>S</italic> so that equally many of the points off the hyperplane lie in each of the two half-spaces. We prove bounds on the number of halving hyperplanes under the condition that the ratio of largest over smallest distance between any two points is at most δ<italic>n</italic><supscrpt>1/<italic>d</italic></supscrpt>, δ some constant. Such a set <italic>S</italic> is called <italic>dense</italic>.
In <italic>d</italic>=2 dimensions, the number of halving lines for a dense set can be as much as &OHgr;(<italic>n</italic>log<italic>n</italic>), and it cannot exceed <italic>O</italic>(<italic>n</italic><supscrpt>5/4</supscrpt>/log*<italic>n</italic>). The upper bound improves over the current best bound of <italic>O</italic>(<italic>n</italic><supscrpt>3/2</supscrpt>/log*<italic>n</italic>) which holds more generally without any density assumption. In <italic>d</italic>=3 dimensions we show that <italic>O</italic>(<italic>n</italic><supscrpt>7/3</supscrpt>) is an upper bound on the number of halving planes for a dense set. The proof is based on a metric argument that can be extended to <italic>d</italic>≥4 dimensions, where it leads to <italic>O</italic>(<italic>n</italic><supscrpt><italic>d</italic>−2/<italic>d</italic></supscrpt>) as an upper bound for the number of halving hyperplanes.
34884676
Cutting dense point sets in half
A halving hyperplane of a set S of n points in ℝd contains d affinely independent points of S so that equally many of the points off the hyperplane lie in each of the two halfspaces. We prove bounds on the number of halving hyperplanes under the condition that the ratio of largest over smallest distance between any two points is at most δn(1/d), δ some constant. Such a set S is called dense.In d = 2 dimensions the number of halving lines for a dense set can be as much as Ω (n log n), and it cannot exceed O (n5/4/log*n). The upper bound improves over the current best bound of O(n3/2/log*n) which holds more generally without any density assumption. In d = 3 dimensions we show that O(n7/3) is an upper bound on the number of halving planes for a dense set. The proof is based on a metric argument that can be extended to d ≥ 4 dimensions, where it leads to O(nd-2/d) as an upper bound for the number of halving hyperplanes.
6301471
Adaptive Simplicial Grids from Cross-Sections of Monotone Complexes
We study the maintenance of a simplicial grid or complex under changing density requirements. The proposed method works in any fixed dimension and generates grids by projecting cross-sections of a monotone simplicial complex that lives in one dimension higher than the grid. The density of the grid is adapted by locally moving the cross-section up or down along the extra dimension.
17780302
Triangulating topological spaces
Given a subspace<inline-equation><f><blkbd>X⊆R</blkbd><sup>d</sup></f></inline-equation> and a finite set <inline-equation><f>S⊆<blkbd>R</blkbd><sup>d</sup></f></inline-equation>, we introduce the Delaunay simplicial complex, <inline-equation><f><sc>D</sc><inf><blkbd>X</blkbd></inf></f></inline-equation>, restricted by <inline-equation><f><blkbd>X</blkbd></f></inline-equation>. Its simplices are spanned by subsets<inline-equation><f>T⊆S</f></inline-equation> for which the common intersection of Voronoi cells meets <inline-equation><f><blkbd>X</blkbd></f></inline-equation> in a non-empty set. By the nerve theorem,<inline-equation><f><lim align="c"><op>⋃</op></lim><sc>D</sc><inf><blkbd>X</blkbd></inf></f></inline-equation> and <inline-equation><f><blkbd>X</blkbd></f></inline-equation> are homotopy equivalent if all such sets are contractible. This paper shows that <inline-equation><f><lim align="c"><op>⋃</op></lim><sc>D</sc><inf><blkbd>X</blkbd></inf></f></inline-equation> and <inline-equation><f><blkbd>X</blkbd></f></inline-equation> <?Pub Caret1>are homeomorphic if the sets can be further subdivided in a certain way so they form a regular CW complex.
31366541
An optimal algorithm for constructing the weighted voronoi diagram in the plane
Let S denote a set of n points in the plane such that each point p has assigned a positive weight w(p) which expresses its capability to influence its neighbourhood. In this sense, the weighted distance of an arbitrary point x from p is given by de(x,p)/w(p) where de denotes the Euclidean distance function. The weighted Voronoi diagram for S is a subdivision of the plane such that each point p in S is associated with a region consisting of all points x in the plane for which p is a weighted nearest point of S. 
 
An algorithm which constructs the weighted Voronoi diagram for S in O(n2) time is outlined in this paper. The method is optimal as the diagram can consist of Θ(n2) faces, edges and vertices.
12582971
Stabbing line segments
An algorithm for the geometric problem of determining a line (called a stabbing line) which intersects each ofn given line segments in the plane is presented. As a matter of fact, the algorithm computes a description of all stabbing lines. A purely geometric fact is proved which infers that this description requiresO(n) space to be specified. Our algorithm computes it inO(n logn) time which is optimal in the worst case.Using the description of the stabbing lines, we are able to decide inO(logn) time whether or not a specified line is a stabbing line. Finally, the problem of maintaining the description of all stabbing lines while inserting and deleting line segments is addressed.
30538700
Computing a Ham-Sandwich Cut in Two Dimensions
Let B be a set of n"b black points and W a set of n"w, white points in the Euclidean plane. A line h is said to bisect B (or W) if, at most, half of the points of B (or W) lie on any one side of h. A line that bisects both B and W is called a ham-sandwich cut of B and W. We give an algorithm that computes a ham-sandwich cut of B and W in 0((n"h+n"w) log (min {n"b, n"w}+ 1)) time. The algorithm is considerably simpler than the previous most efficient one which takes 0((n"b + n"w) log (n"b + n"w)) time.
43503455
Computing the Extreme Distances Between Two Convex Polygons
Abstract A polygon in the plane is convex if it contains all line segments connecting any two of its points. Let P and Q denote two convex polygons. The computational complexity of finding the minimum and maximum distance possible between two points p in P and q in Q is studied. An algorithm is described that determines the minimum distance (together with points p and q that realize it) in O (log m + log n ) time, where m and n denote the number of vertices of P and Q , respectively. This is optimal in the worst case. For computing the maximum distance, a lower bound Ω(m + n) is proved. This bound is also shown to be best possible by establishing an upper bound of O ( m + n ).