In this paper, we investigate triangulations of two categories of surfaces: flat tori, i.e., surfaces of genus 1 with a locally Euclidean metric, and hyperbolic surfaces, i.e., surfaces of genus at least 2 with a locally hyperbolic metric (these surfaces will be introduced more formally in Section 2.1).
Triangulations of surfaces can be considered in a purely topological manner: a triangulation of a surface is a graph whose vertices, edges and faces partition the surface and whose faces have three (non-necessarily distinct) vertices. However, when the surface is equipped with a Euclidean or hyperbolic structure, it is possible to consider geometric triangulations, i.e., triangulations whose edges can be realized as interior disjoint locally geodesic segments (Definition 2.1). Note that a geometric triangulation can still have loops and multiple edges, but no contractible loop and no contractible cycle formed of two edges. We will prove that any Delaunay triangulation (Definition 2.3) of the considered surfaces is geometric (Proposition 3.3).
The flip graph of triangulations of the Euclidean plane has been well studied. It is known to be connected; moreover the number of edge flips that are needed to transform any given triangulation with vertices in the plane into the Delaunay triangulation has complexity [HNU]. We are interested in generalizations on this result to surfaces. Flips in triangulations of surfaces will be defined precisely later (Definition 2.4), for now we can just think of them as similar to edge flips in triangulations of the Euclidean plane. We emphasize that geodesics only locally minimize the length, so the edges of a geometric triangulation are generally not shortest paths. We will prove that the number of geometric triangulations on a set of points can be infinite, whereas the flip graph of ”shortest path” triangulations is small but not connected in most situations [CGH].
Let be either a torus equipped with a Euclidean structure or a closed oriented surface equipped with a hyperbolic structure . Let be a set of points. The geometric flip graph of is the graph whose vertices are the geometric triangulations of with vertex set and where two vertices are connected by an edge if and only if the corresponding triangulations are related by a flip.
Our results are mainly interesting in the hyperbolic setting, which is richer than the flat setting. However, to help the readers’ intuition, we also present them for flat tori, where they are slightly simpler to prove and might even be considered as folklore. The geometric flip graph is known to be connected for the special case of flat surfaces with conical singularities and triangulations whose vertices are these singularities [Tah].
The main results of this paper are:
If an initial triangulation of the surface only having one vertex is given, then the Delaunay triangulation can thus be computed incrementally by inserting points one by one in a very standard way: for each new point, the triangle containing it is split into three, then the Delaunay property is restored by propagating flips. This approach, based on flips, can handle triangulations of a surface with loops and multiarcs, which is not the case for the approach based on Bowyer’s incremental algorithm [CT, BTV]. The work presented here can hardly be compared with broad results on computing Delaunay triangulations on very general manifolds [BDG].
2. Background and notation
In this section, we first recall a few notions, then we illustrate them for the two classes of surfaces (flat tori and hyperbolic surfaces) that we are interested in.
Let be a closed oriented surface, i.e., a compact connected oriented 2-manifold without boundary. There is a unique simply connected surface , called the universal cover of , equipped with a projection that is a local diffeomorphism. There is a natural action on of the fundamental group of so that for all , is an orbit under the action of . We will denote as a lift of , i.e., one of the elements of the orbit . A fundamental domain in for the action of on is a connected subset of that intersects each orbit in exactly one point, or, equivalently, such that the restriction of to is a bijection from to [Mas]. The genus of is its number of handles. In this paper, we consider surfaces with constant curvature ( or ). The value of the curvature is given by Gauss-Bonnet Theorem and thus only depends on the genus: a surface of genus only admits spherical structures (not considered here); a flat torus is a surface of genus and admits Euclidean structures; a surface of genus and above admits only hyperbolic structures (see below).
From now on, will denote either a flat torus or a closed hyperbolic surface.
We denote by the topological torus, that is, the product of two copies of the circle. Flat tori are obtained by taking the quotient of the Euclidean plane by an Abelian group generated by two independent translations. There are in fact many different Euclidean structures on
; if one considers Euclidean structures up to homothety – which is sufficient for our purposes here – a Euclidean structure is uniquely determined by a vectorin the upper half-plane : to such a vector is associated the Euclidean structure where and is linearly independent from . The orbit of a point of the plane is a lattice. The area of the surface is . The plane , equipped with the Euclidean metric, is then isometric to the universal cover of the corresponding quotient surface.
We now consider a closed oriented surface (a compact oriented surface without boundary) of genus . Such a surface does not admit any Euclidean structure, but it admits many hyperbolic structures, corresponding to metrics of constant curvature , locally modeled on the hyperbolic plane . Given a hyperbolic structure on , the surface is isometric to the quotient , where is a (non-Abelian) discrete subgroup of the isometry group of isomorphic to the fundamental group . The universal cover is isometric to the hyperbolic plane .
For completeness, we recall below some properties of the hyperbolic plane.
2.2. The Poincaré disk model of the hyperbolic plane
In the Poincaré disk model [Ber], the hyperbolic plane is represented as the open unit disk of . The points on the unit circle represent points at infinity. The geodesic lines consist of circular arcs contained in the disk and that are orthogonal to its boundary (Figure 1 (left)). The model is conformal, i.e., the Euclidean angles measured in the plane are equal to the hyperbolic angles.
We won’t need the exact expression of the hyperbolic metric here. However, the notion of hyperbolic circle is relevant to us. Three non-collinear points in the hyperbolic plane determine a circle, which is the restriction to the Poincaré disk of a Euclidean circle or line. If is a Euclidean circle or line and is an isometry of the hyperbolic plane, then is still the intersection with of a Euclidean circle or a line.
A key difference with the Euclidean case is that the “circle” defined by 3 non-collinear points in is generally not compact (i.e., it is not included in the Poincaré disk). The compact circles are sets of points at constant (hyperbolic) distance from a point. Non-compact circles are either horocycles or hypercycles, i.e., connected components of the set of points at constant (hyperbolic) distance from a hyperbolic line (Figure 1 (right)) [Gar].111A synthetic presentation can be found at http://en.wikipedia.org/wiki/Hypercycle_(geometry) Therefore, the relatively elementary tools that can be used for flat tori must be refined for hyperbolic surfaces. Still, some basic properties of circles still hold for non-compact circles. A non-compact circle splits the hyperbolic plane into two connected regions. We will call disk the region of the corresponding Euclidean disk that lies in the Poincaré disk. When a non-compact circle is determined by the three vertices of a triangle, its associated disk is convex (in the hyperbolic sense) and contains the whole triangle.
2.3. Triangulations on surfaces
Let be either a torus equipped with a Euclidean structure or a closed surface equipped with a hyperbolic structure . Let be a finite subset of points, and let be a triangulation of with vertex set .
Recall that given two distinct points , any homotopy class of paths on with endpoints and contains a unique locally geodesic segment. We can recall the following simple notion of geometric triangulation.
A triangulation on is said to be geometric for if it can be realized with interior disjoint locally geodesic segments as edges.
If is a triangulation of , its inverse image222the notion of pull-back would be more correct but we stay with inverse image for simplicity is the (infinite) triangulation of with vertices, edges and faces that are connected components of the lifted images by of the vertices, edges and faces of .
The diameter of is the smallest diameter of a fundamental domain that is the union of lifts of the triangles of (with geodesic edges) in .
The diameter is not smaller than the diameter of . It is unclear how to compute algorithmically and the problem looks difficult. However bounds are easy to obtain: is at least equal to the maximum of the diameters of the triangles of in and is at most the sum of the diameters of these triangles.
We say that a triangulation of is a Delaunay triangulation if for each face of and any face of , there exists an open disk in inscribing that is empty, i.e., that contains no vertex of .
We will see in Section 3 that any Delaunay triangulation of is geometric.
Remark that, even for a hyperbolic surface, every empty disk in the universal cover is compact. Indeed, any non-compact disk contains at least one disk of any diameter, so, at least one disk of diameter , thus it contains a fundamental domain (actually, infinitely many fundamental domains) and cannot be empty.
Let us now give a natural definition for flips in triangulations of surfaces. It is based on the usual notion of flips in the Euclidean plane.
Let be a triangulation of . Let and be two adjacent triangles in , sharing the edge . Let us lift the quadrilateral to so that and form two adjacent triangles of sharing the edge .
Flipping in consists in replacing the diagonal in the quadrilateral (which lies in , i.e., or ) by the other diagonal , then projecting the two new triangles and to by .
We say that the flip of along is Delaunay if the triangulation is locally Delaunay in the quadrilateral after the flip, i.e., the disk inscribing does not contain (and the disk inscribing does not contain ).
An edge is said to be Delaunay flippable if the flip along is Delaunay.
Note that even if is geometric, the triangulation after a flip is not necessarily geometric. We will prove later (Lemma 4.1) that a Delaunay flip transforms a geometric triangulation into a geometric triangulation.
Degenerate sets of points on a surface.
Let us quickly examine here the case of degenerate sets of points, i.e., sets of points on such that the infinite Delaunay triangulation of is not unique, i.e., at least two adjacent triangles in the possible Delaunay triangulations of in have cocircular vertices. In such a case, any triangulation of the subset of consisting of cocircular points is a Delaunay triangulation. Any of these triangulations can be transformed in any other by flips [HNU]. From now on, we can thus assume that the set of points on the surfaces that we consider is always non-degenerate.
Triangulations and polyhedral surfaces.
The Euclidean plane can be identified with the plane in , while the Poincaré model of the hyperbolic plane can be identified with the unit disk in that plane. We can now use the stereographic projection to send the unit sphere to this plane , where is the pole. In this projection, each point on the sphere is sent to the unique intersection with the plane of the line going through and . The inverse image of the plane is , while the inverse image of the disk containing the Poincaré model of the hyperbolic plane is a disk, which is the set of points of above a horizontal plane.
Let be a triangulation of the Euclidean or the hyperbolic plane – for instance, could be the inverse image of a triangulation of a surface , in which case has infinitely many vertices. We associate to a polyhedral surface in , constructed as follows. The construction is similar to the classic duality originally presented with a paraboloid in the case of (finite) triangulations in a Euclidean space [ES]. It can also be seen as a simpler version, sufficient for our purpose, of the construction presented for triangulations in hyperbolic spaces using the space of spheres [BDT].
The vertices of are the inverse images on by of the vertices of .
The edges of are line segments in corresponding to the edges of and the faces of are triangles in corresponding to the faces of .
Note that is not necessarily convex. We can make the following well-known remarks. Let and be two triangles of sharing an edge , and let and be corresponding faces of the polyhedral surface , sharing the edge . Then is concave at if and only if is Delaunay flippable. Flipping in the triangulation in the plane corresponds to replacing the two faces and of by the two other faces of the tetrahedron formed by their vertices. That tetrahedron lies between and . We obtain a new edge at which the new polyhedral surface is convex, and which is strictly closer to than . By an abuse of language, we will say that contains , which we will denote as .
As a consequence, is convex if and only if is Delaunay.
There is a direct corollary of this statement: Given a (non-degenerate, see above) discrete set of points in or , there is a unique Delaunay triangulation with this set of vertices.
However we are going to see in the next two sections that there can be infinitely many geometric (non-Delaunay) triangulations on a surface, with the same given finite vertex set.
3. Geometric triangulations of surfaces
We consider now Dehn twists, which are usually considered as acting on the space of metrics on a surface [CB], but are defined here equivalently, for simplicity, as acting on triangulations of a closed oriented surface equipped with a fixed Euclidean or hyperbolic structure (figures in this section illustrate the flat case, but the results are proved for both flat and hyperbolic cases). Let be a triangulation of , with vertex set , and let be an oriented homotopically non-trivial simple closed curve on . We define a new triangulation of by performing a Dehn twist along : whenever an edge of intersects at a point , we orient so that the unit vectors of the tangent plane along and form a positively oriented basis (see Figure 2 (left)), and then replace by the oriented path following until , then following until it comes back to , then following until its endpoint (see Figure 2 (right)). This defines a map from the space of triangulations of with vertex set to itself. Note that, even if is a geometric triangulation, is not necessarily geometric. If we denote by the curve with the opposite orientation, then one easily checks that .
There exists a geometric triangulation of and a simple closed curve such that for all , is geometric.
We choose a simple closed geodesic on and . We denote by the two geodesics at distance from on the positive and negative sides of . The value of must be sufficiently small so that the region between and is an annulus drawn on . We then choose a geometric triangulation of with no vertex in the open annulus bounded by and and containing , such that each edge crossing intersects exactly once, and has one endpoint on and another on .
We realize the image by of an edge of as a geodesic segment – there is a unique choice in the homotopy class of the path described above (Figure 3).
Let be two edges of . If either or does not intersect , then their images by (or ) remain disjoint, as they lie in different regions separated by and . If and intersect , then again their images by (or ) remain disjoint, as their endpoints appear in the same order on and and two geodesic lines cannot intersect more than once (Figure 4).
As a consequence, (and ) are geometric. The same result follows by induction for for any . ∎
For any closed oriented surface , there exists a finite set of points such that the graph of geometric triangulations with vertex set is infinite.
We can now prove the following result:
Any Delaunay triangulation of a closed oriented surface is geometric.
Let be a finite set of points on , and let be the Delaunay triangulation of with vertex set . Realize every edge of as a the unique geodesic segment in its homotopy class. We argue by contradiction and suppose that is not geometric, so that there are two edges and that intersect in their interiors. We then lift and to edges and of whose interiors still intersect at one point.
There are at least two distincts faces and of such that is an edge of and is an edge of . Let and be the circles inscribing and , respectively. Since is Delaunay, and bound empty disks and , i.e., open disks not containing any point of . Recall that, as mentioned in Section 2.3, empty disks are compact even in the hyperbolic case, and that and (edges are considered as open).
The two circles and do not intersect more than twice. Let be the geodesic line through their two intersection points. The endpoints of are on and those of are on , so the two pairs of endpoints are on opposite sides of . As a consequence, and are on opposite sides of , so they cannot intersect. This leads to a contradiction. ∎
4. The flip algorithm
Let us consider a closed oriented surface . The flip algorithm consists in performing Delaunay flips in any order, starting from a given input geometric triangulation of , until there is no more Delaunay flippable edge.
In this section, we first define a data structure that supports this algorithm, then we prove the correctness of the algorithm.
4.1. Data structure
In both cases of a flat or hyperbolic surface, the group of isometries defining the surface is denoted as . We assume that a fundamental domain is given. By definition (Section 2.1), is the union of the images of under the action of .
To represent a triangulation on the surface, we propose a data structure generalizing the data structure previously introduced for triangulations of flat orbifolds [CT] and triangulations of the Bolza surface [IT]. The combinatorics of the triangulation is given by the set of its vertices on the surface and the set of its triangles, where each triangle gives access to its three vertices in and its three adjacent triangles, and each vertex gives access to one of its incident triangles. The geometry of the triangulation is given by the set of the lifts of its vertices that lie in the fundamental domain and one lift in of each triangle of the triangulation, chosen among the (one, two, or three) lifts of in having at least one vertex in : has at least one of its vertices in (, or ); then the other vertices of are images and of two vertices in , where and are elements of (indices are taken modulo 3). In the data structure, each vertex on the surface has access to its representative , and each triangle on the surface has access to the isometries , and allowing to construct , at least one of the isometries being the identity . Note that two triangles and of that are adjacent on the surface are represented by two triangles and , which are not necessarily adjacent in (Figure 5 (left)). However, there is an isometry in such that and are adjacent.
Let be an input triangulation given as such a data structure. Figure 5 illustrates a Delaunay flip performed on two adjacent triangles and on the surface. The triangle is first moved so that the vertices of the edge to be flipped coincide. Then the edge is flipped. The isometries in the two triangles created by the flip are easy to compute from the isometries stored in and . Note that the order in which isometries are composed is crucial in the hyperbolic case, as they do not commute. We have shown that the data structure can be maintained through flips.
4.2. Correctness of the algorithm
The following statement is a key starting point.
Let be a geometric triangulation of , and let be obtained from by a Delaunay flip. Then is still geometric.
Let be a Delaunay flippable edge and a lift in . Denote the vertices of by and . Let and be the triangles of incident to . To prove that is geometric, it is sufficient to prove that is a strictly convex quadrilateral.
Let (resp. ) be the circle through the three vertices of (resp. ). Note that and may be non-compact. Let and be the corresponding disks (as defined in Section 2.2 on case of non-compact circles). The disk (resp. ) is convex (in the Euclidean plane if is a flat torus, or in the sense of hyperbolic geometry if is a hyperbolic surface) and contains (resp. ). The fact that is Delaunay flippable then implies that and are contained in (see Figure 6).
As a consequence, the sum of angles of and at is smaller than the interior angle at of , which is at most , and similarly at . As a consequence, the quadrilateral is strictly convex at and . Since it is strictly convex at its other two vertices (as each of these vertices is a vertex of a triangle), it is strictly convex, and the statement follows. ∎
The following lemma, using the diameter of the triangulation (Definition 2.2), is central in the proof of the termination of the algorithm (Theorem 4.6) for hyperbolic surfaces and in its analysis for both flat tori and hyperbolic surfaces (Section 5).
Let be a geometric triangulation of . Then, the flip algorithm starting from will never insert an edge longer than .
Note that the length of an edge can be measured on any or its lifts in the universal covering space .
Let be the triangulation obtained from after flips and let be the corresponding polyhedral surface of as defined in Section 2.3. Since we perform only Delaunay flips, (with the abuse of language mentioned in Section 2.3).
We will prove the result by contradiction. Let us assume that has an edge of length larger than . Let be a fundamental domain of having diameter , given as the union of lifts of triangles of (it is not clear how to compute such a fundamental domain efficiently but its existence is clear). Let be the midpoint of and its lift in . Let be the unique lift of whose midpoint is . The domain is strictly included in the disk of radius and centered at , by definition of (see Figure 7 (left)).
Let denote the plane in containing the circle on that is the boundary of (recall that denotes the stereographic projection, see Section 2.3), and let denote the point on . As , the projection of onto lies above (Figure 7 (right)).
Now, denote the edge on as . The points and lie outside . So, the corresponding edge of lies below the plane , thus the projection of onto lies below .
From what we have shown, is a point of that lies strictly between the pole and the point of , which contradicts the inclusion . ∎
We will now show that, for any order, the flip algorithm terminates and returns the Delaunay triangulation of the surface. The proof given for the hyperbolic case would also work for the flat case. However we propose a more elementary proof for the flat case.
The case of flat tori is easy, and might be considered as folklore. However, as we have not found a reference, we give the details here for completeness.
We define the weight of a triangle of a geometric triangulation of as the number of vertices of that lie in the open circumdisk of a lift of . The weight of is defined as the sum of the weights of its triangles.
The weight of a triangulation of a flat torus is finite. Let be the triangulation obtained from a geometric triangulation after performing a Delaunay flip. Then .
A circumdisk of any triangle in is compact, so, it can only contain a finite number of vertices of . The sum of these numbers over triangles of is clearly finite as the number of triangles of is finite. Let us now focus on a quadrilateral in that is a lift of the quadrilateral on whose diagonal is flipped. Let and denote the two open circumdisks in before the flip and and denote the two open circumdisks after the flip, then and (see Figure 8).
Moreover, by definition of a Delaunay flip, the union contains at least two fewer vertices of than , which are the two vertices of the quadrilateral that are not vertices of . This concludes the proof. ∎
The result follows trivially:
Let be a geometric triangulation of a flat torus with finite vertex set . The flip algorithm terminates and outputs the Delaunay triangulation of .
The geometric flip graph is connected.
To show that the flip algorith terminates in the hyperbolic case, we cannot mimic the proof presented for the flat tori since the circumcircle of a hyperbolic triangle can be non-compact (see Section 2.2) and thus can have an infinite weight. Note also that the proof cannot use a property on the angles of the Delaunay triangulation similar to what holds in the Euclidean case: in , the locus of points seeing a segment with a given angle is not a circle arc, and thus the Delaunay triangulation of a set of points in does not maximize the smallest angle of triangles. The proof relies on Lemma 4.2.
Let be a geometric triangulation of a closed hyperbolic surface with finite vertex set . The flip algorithm terminates and outputs the Delaunay triangulation of .
We use the same notation as in the proof Lemma 4.2. Once an edge of is flipped, it can never reappear in the triangulation, as the corresponding segment in becomes interior to the polyhedral surface (see Section 2.3) and further surfaces . In addition, all the introduced edges have length smaller than by Lemma 4.2. Moreover, there is only a finite number of edges with vertices in that are shorter than on , as a circle given by a center and a bounded radius is compact. So, the flip algorithm terminates. The output does not have any Delaunay flippable edge, so, it is the Delaunay triangulation. ∎
The geometric flip graph is connected.
5. Algorithm analysis
For a triangulation on vertices in the Euclidean plane, counting the weights of triangulations leads to the optimal bound. However the same argument does not yield a bound even for the flat torus, since points must be counted in the universal cover.
For any triangulation with vertices of a torus , there is a sequence of flips of length connecting to a Delaunay triangulation of , where only depends on .
Let be an edge appearing during the flip algorithm, and (resp. ) be a lift of (resp. ), such that is a lift of . The point lies in a circle of diameter centered at by Lemma 4.2. Let be the affine transformation that maps the lattice of the lifts of to the square lattice . is a convex set and from Pick’s theorem [Tra],333See also https://en.wikipedia.org/wiki/Pick’s_theorem#Inequality_for_convex_sets the number of points of in is smaller than , which is also a bound on the number of possible points in and thus the number of possible edges . The area of is since , but there is no simple formula for its perimeter. As already mentioned in the proof of Theorem 4.6, an edge can never reappear after it was flipped. Moreover, there are sets of points ( and may be the same point), which yields the result. ∎
The rest of this section is devoted to computing the number of edges not longer than between two fixed points and on a hyperbolic surface . Counting the number of points in a disk of fixed radius would give an exponential bound because the area of a circle in is exponential in its radius [Mar]. Note that we only consider geodesic edges, so we only need to count homotopy classes of simple paths. The behavior of the number of simple closed curves smaller than a fixed length is well understood: converges to a positive constant depending “continuously” on [Mir]. However, we need a result for geodesic paths instead of geodesic closed curves, and Mirzakhani’s proof is too deep and relies on too sophisticated structures to easily be generalized. So, we will only prove an upper bound on the number of paths. Such an upper bound could be derived from the theory of measured laminations of Thurston, which is also quite intricate. Fortunately, a more comprehensible proof, specific to simple closed geodesic curves on hyperbolic structures, can be found in a book published by the French Mathematical Society [FLP, 4.III, p.61-67][FLP]. While recalling the main steps of the proof, we show how to extend it to geodesic paths.
Let be a set of simple disjoint closed geodesics on not containing and that forms a pants decomposition on , where each belongs to two different pairs of pants. A set of disjoint closed annuli is defined on , where each is a tubular neighborhood of containing none of . This yields a decomposition of into annuli and pairs of “short pants” . For , let us denote as any one of the two curves bounding the annulus (this is an abuse of notation but should not introduce any confusion). In each pair of pants , for each boundary , an arc is drawn in , going from the boundary of to itself that separates the other two boundaries of and that has minimal length.
Two curves and are associated to each in the following way (Figure 9). The annulus is glued with the two pairs of pants and between which it is lying, which yields a sphere with four boundaries: and bounding and and bounding .
A curve is then defined: it coincides with in and in , it separates and from and , and it has exactly 2 crossings with . The curve is defined in the same way, separating and from and .
For each and , a model multiarc is fixed in , having , and intersections with the three boundaries , and of (if one exists). The model is chosen among all the possible model multiarcs as the one that has a minimal number of intersections with the three arcs of . The model multiarcs is unique, up to homeomorphisms of the pair of pants, and those homeomorphisms are rather simple to understand since they can be decomposed into three Dehn twists around curves homotopic to the three boundaries of the pair of pants.
Let now be a path between and on . We decompose into three parts: , and where and are the first and the last point of on an annulus boundary. We “push” all the twists of into the annuli , and obtain a normal form homotopic to , whose definition adapts the definition given in the book [FLP] for closed curves:
It is simple.
It has a minimal number of intersections with each .
In each , it is homotopic with fixed endpoints to the model multiarc that corresponds to the number of intersections with its boundaries. For (resp. ) containing (resp. ), only the intersections different from (resp. ) are counted.
Between and (resp. and ), it has a minimal number of intersections with the three arcs in containing (resp. in containing ).
It has a minimal number of intersections with inside , for any .
It has a minimal number of intersections with inside , for any .
The existence of a normal form is clear but its uniqueness is unclear (uniqueness is not required for the upper bound that we are looking for, but it can actually be proved by extension of the next lemma). The two forms of the path are used to define two notions of complexity: its geodesic form is used to define its length, which can be seen as a geometric complexity, whereas its its normal coordinates , and can be seen as a combinatorial complexity. Lemma 5.3 shows some equivalence between the two notions of complexity. We first show that a fixed set of coordinates corresponds to a finite number of possible non-homotopic paths.
For any set of coordinates , there are at most non-homotopic normal forms.
Let be a path, decomposed as above into , and . The uniqueness for closed curves comes from the facts that in each pair of pants, fixing the , and leads to a unique homotopy class of model multiarcs [FLP, Lemma 5, p.63]. Everything remains true but the uniqueness of the homotopy class of model multiarcs in the two (not necessarily different) pairs of pants and containing and . However, and are fixing unique models (see Figure 10).
There are three possible annulus boundaries for in the pair of pants that contains (resp. for ), so, at most possibilities for each of them. The choices for and are independent and the result follows. ∎
Let be a geodesic path of length , then there exists a constant such that the coordinates and of the normal form of are smaller than .
For any simple closed geodesic on , the geodesic form of intersects in a minimal number of points, since they are both geodesics. If is the width of a tubular neighborhood of , then [BS, Lemma 3.1]. Each coordinate and of corresponds to the minimal number of intersections with a curve. The number corresponds to . The number is actually not larger than the number of intersections of with the geodesic curve that is homotopic to ( is generally not geodesic), and similarly is not larger than the number of intersections of with the geodesic homotopic to . These curves only depend on , so, we can take to be the largest of all the widths and we obtain and thus . ∎
For any hyperbolic structure on and any triangulation of , there is a sequence of flips of length at most in the geometric flip graph connecting to a Delaunay triangulation of .
Let be the number of paths from to shorter than . From the previous lemma, we obtain that the coordinates , and of any such path are smaller than . It appears that, , or [FLP, Lemma 6, p.64]. So, if we fix and there are at most 3 possible . Lemma 5.2 and 5.3 proves that there are potential paths for each coordinate set. We obtain a bound for : and thus, there is a constant such that . Since there are possible sets , we obtain the bound on the number of edges. ∎
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