On Planar Straight-Line Dominance Drawings
Abstract
We study the following question, which has been considered since the 90’s: Does every -planar graph admit a planar straight-line dominance drawing? We show concrete evidence for the difficulty of this question, by proving that, unlike upward planar straight-line drawings, planar straight-line dominance drawings with prescribed -coordinates do not always exist and planar straight-line dominance drawings cannot always be constructed via a contract-draw-expand inductive approach. We also show several classes of -planar graphs that always admit a planar straight-line dominance drawing. These include -planar -trees in which every stacking operation introduces two edges incoming into the new vertex, -planar graphs in which every vertex is adjacent to the sink, and -planar graphs in which no face has the left boundary that is a single edge.
Keywords and phrases:
-graphs, dominance drawings, planar straight-line drawings, upward planarityFunding:
Giuseppe Di Battista: Supported by the European Union, Next Generation EU, Mission 4, Component 1, CUP C53D23003680006 PRIN project no. 2022TS4Y3N “EXPAND: scalable algorithms for EXPloratory Analyses of heterogeneous and dynamic Networked Data”.Copyright and License:
Giacomo Ortali; licensed under Creative Commons License CC-BY 4.0
2012 ACM Subject Classification:
Theory of computation Computational geometry ; Mathematics of computing Graph algorithmsAcknowledgements:
This research initiated at the First Summer Workshop on Graph Drawing (SWGD 2021). Thanks to the organizers and the participants for an inspiring atmosphere.Editors:
Pat Morin and Eunjin OhSeries and Publisher:
Leibniz International Proceedings in Informatics, Schloss Dagstuhl – Leibniz-Zentrum für Informatik
1 Introduction
Drawings of directed graphs are an evergreen research topic in the graph drawing literature. Early papers on the subject go back to the 80’s [13, 14, 34] and the number of papers on the topic published since 2023 is in double digits [1, 2, 3, 4, 6, 7, 9, 10, 11, 12, 16, 20, 22, 23, 24, 25, 28, 30]. From an applicative perspective, many domains require techniques for visualizing directed graphs, such as visualization tools for biological networks and SIEM systems for cyber threat intelligence. Many standards for drawing directed graphs have been defined, and in most of them the drawing is upward, i.e., each edge is represented by a Jordan arc whose -coordinates monotonically increase from the tail to the head of the edge. Di Battista and Tamassia [14] proved that every upward planar graph (that is, a directed graph that admits an upward planar drawing) admits an upward planar straight-line drawing, a result analogous to Fary’s celebrated result about the geometric realizability of planar graphs [19]. In order to prove the geometric realizability of upward planar graphs, it suffices to look at upward planar graphs whose faces are delimited by -cycles. Indeed, every upward planar graph is a subgraph of an -planar graph [14] (that is, an upward planar graph with a single source and a single sink ), which in turn is a subgraph of a maximal -planar graph [14] (that is, an -planar graph to which no edge can be added without losing simplicity or upward planarity).
One of the easiest algorithms, if not the easiest algorithm, for constructing upward planar straight-line drawings is due to Di Battista, Tamassia and Tollis [15]. This algorithm assigns - and -coordinates to the vertices simply by performing two pre-order traversals of the input -planar graph. Moreover, the algorithm constructs upward planar straight-line drawings that are actually dominance drawings. These are -monotone drawings (that is, each edge is represented by a Jordan arc whose - and -coordinates monotonically increase from the tail to the head of the edge) such that, for any pair of vertices , there exists a directed path from to in the graph if and only if and hold in the drawing. Dominance drawings constitute an interesting graph drawing style because they express the reachability between vertices by their dominance relationship, i.e., by the coordinates assigned to them; this allows one to answer reachability queries in constant time, see, e.g, [27, 35]. For more about dominance drawings, see, e.g., [5, 8, 18, 26, 31, 32, 34]. Figure 1 shows planar straight-line drawings of an -planar graph that are non-upward, upward (and not -monotone), -monotone (and not dominance), and dominance.
Di Battista, Tamassia and Tollis’s algorithm [15] does not actually construct an upward planar straight-line drawing of every -planar graph. Indeed, it may construct a non-planar drawing if the input -planar graph contains transitive edges, where an edge is transitive if the graph contains a directed path from the tail to the head of the edge. By subdividing each transitive edge with a new vertex, their algorithm constructs a planar dominance drawing of any -planar graph in which each edge is either a straight-line segment (if it is non-transitive) or a -bend polyline (if it is transitive). Whether this bend per edge can be eliminated by designing an algorithm different from the one in [15] is the question we study in this paper.
Formally, we ask: Does every -planar graph admit a planar straight-line dominance drawing? Apart from the -planar graphs without transitive edges, the question is known to have a positive answer for series-parallel digraphs [8]. We prove the following results.
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In Section 3, we prove a remarkable difference between dominance and upward drawings. We revisit the two main approaches for the construction of upward planar straight-line drawings of -planar graphs and prove that they cannot be successfully applied to construct planar straight-line dominance drawings. The first approach [14] contracts an internal edge of the graph, constructs a drawing inductively, and then expands the previously contracted edge to be a “short” segment. We show that there exist -planar graphs in which no edge can be used in the contract-draw-expand approach so to get a planar straight-line dominance drawing. The second method [17, 21, 33] prescribes the -coordinates of the vertices, so that the tail of any edge is assigned a smaller -coordinate than its head. This additional constraint on the drawing allows for easier recursive schemes for its construction. We prove that planar straight-line dominance drawings with prescribed -coordinates do not always exist. We believe that these results provide solid evidence for the difficulty of constructing planar straight-line dominance drawings.
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In Section 4, we study -planar graphs whose underlying graph is a planar -tree. Planar -trees, also known as stacked triangulations and Apollonian networks, constitute a common benchmark for planar graph drawing problems, as they allow for easy inductive constructions; for example, every planar -tree with at least four vertices can be constructed by “stacking” a vertex inside a face of a smaller planar -tree. For our question, the study of -planar -trees turns out to be complicated, as inductive drawing constructions do not cope well with the dominance relationship that needs to be ensured between vertices that are “far away” in the graph. We show how to construct planar straight-line dominance drawings for two classes of -planar -trees, the first one with a constraint on the orientation (every stacking operation introduces two edges incoming into the new vertex) and the second one with a constraint on the graph structure (every stacking operation happens in a face incident to the sink). The latter graph class coincides with the maximal -planar graphs in which the sink is adjacent to every vertex.
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In Section 5, we improve the mentioned result by Di Battista, Tamassia and Tollis [15], by proving that a planar straight-line dominance drawing always exists for any -planar graph in which every transitive edge is to the right of every directed path from the tail to the head of the edge. This result is obtained via an ear decomposition of the graph. This shows that the problem of constructing planar straight-line dominance drawings is made difficult by the interaction between “left transitive edges” and “right transitive edges”.
All our algorithms construct drawings whose resolution is exponentially small (or worse). This drawback is sometimes necessary for upward planar straight-line drawings [15], and hence also for planar straight-line dominance drawings. However, for the graph classes we considered, we do not know whether an exponentially-small resolution is actually required in order to construct planar straight-line dominance drawings.
2 Preliminaries
A drawing of a graph maps each vertex to a distinct point in the plane and each edge to a Jordan arc between its endpoints. A drawing is straight-line if each edge is represented by a straight-line segment and planar if no two edges intersect, except at common endpoints. Two planar drawings of a connected graph are plane-equivalent if they define the same clockwise order of the edges incident to each vertex and the same clockwise order of the vertices and edges along the boundary of the outer face. A plane embedding is an equivalence class of planar drawings and a plane graph is a graph with a plane embedding. Whenever we talk about planar drawings of a plane graph, we always assume that they are in the equivalence class associated with the plane graph. An -plane graph is an -planar graph with a plane embedding (for its underlying graph) in which and are incident to the outer face. An -plane graph is maximal if no edge can be added to it while maintaining it an -plane graph. Since every -planar graph can be augmented (by adding vertices and edges) to maximal without altering the reachability between vertices [14], the existence of a planar straight-line dominance drawing for all -planar graphs can be decided by only looking at maximal -planar graphs. Note that, in any planar straight-line dominance drawing of an -planar graph, the vertex placements can be perturbed so that no two vertices share the same - or the same -coordinate and so that the drawing remains planar, straight-line and dominance. Hence, throughout the paper, every considered dominance drawing has distinct - and distinct -coordinates for its vertices. Two vertices in a directed graph are incomparable if no directed path goes from any of the vertices to the other one.
As a warm-up result, we prove that every Hamiltonian -planar graph has a planar straight-line dominance drawing. A directed graph is Hamiltonian if it contains a directed path , where is the vertex set of the graph.
Theorem 1.
Hamiltonian -planar graphs admit planar straight-line dominance drawings.
Proof.
Consider a Hamiltonian -planar graph . Construct an upward planar straight-line drawing of ; this always exists [14]. Stretch vertically, so that the slope of every edge is in the range . Now rotate in clockwise direction by . Since the slope of every edge is now in the range , we have that is -monotone. Since vertical stretch and rotation are affine transformations, is planar, as well. Finally, since contains a Hamiltonian path , vertex is reachable from vertex , for every . Since the slope of the edge is in the range , for , vertex is in the first quadrant of vertex , hence is a dominance drawing.
3 Planar Straight-line Dominance Drawings are Difficult to Get
In this section, we revisit the two main approaches for the construction of upward planar straight-line drawings of -planar graphs and prove that they cannot be enhanced (or at least not in a direct way) to construct planar straight-line dominance drawings.
3.1 Constructing Drawings via Contractions and Expansions
Di Battista and Tamassia [14] first proved that every -plane graph admits an upward planar straight-line drawing. Their proof extends to directed graphs a well-known proof by Fáry [19], showing that every (undirected) plane graph admits a planar straight-line drawing. We briefly describe the algorithm by Di Battista and Tamassia [14].
An internal edge of a maximal -plane graph is contractible if it satisfies the following conditions: (1) The vertices and have exactly two common neighbors, denoted by and ; note that the cycles and delimit internal faces of . (2) For , the edges connecting and with are both incoming or both outgoing at .
The contraction of a contractible edge constructs a graph by identifying and into a vertex with the following adjacencies (see Fig 2(a)). For every neighbor of (of ), we have that contains an edge between and , which is outgoing at if and only if the edge between and (resp. between and ) is outgoing at . Also, for , we have that contains an edge between and , which is outgoing at if and only if the edges connecting and with are both outgoing at . It is easy to see that is a maximal -plane graph.
The core of Di Battista and Tamassia’s algorithm lies in the following two statements111Di Battista and Tamassia’s proof actually distinguishes the case in which contains a separating triangle (a -cycle with vertices in its interior) from the case in which it does not, performing different constructions in the two cases. However, the first case is unnecessary, as a contractible edge in an -planar graph can always be found, similarly to what was noted by Wood [36] for undirected graphs.: (i) every maximal -plane graph has a contractible edge , whose contraction results in a maximal -plane graph ; and (ii) an upward planar straight-line drawing of can be obtained from an upward planar straight-line drawing of by expanding , that is, by replacing with a sufficiently small segment (with a suitable slope) representing .
Since, depending on the geometric placement of the neighbors of in , the edge might need to be an arbitrarily small segment in , in order for to be a dominance drawing we need and to have the same successors and predecessors. That is, let be the set of successors of a vertex , that is, the set of all vertices such that there exists a directed path from to . Analogously, let be the sets of predecessors of a vertex . A contractible edge is dominance-expandable if and . Di Battista and Tamassia’s approach could be enhanced to construct planar straight-line dominance drawings if every maximal -plane graph contained a dominance-expandable edge. However, we can prove that there exist maximal -plane graphs with no dominance-expandable edge, as the one in Fig 2(b), which constitutes a barrier for this approach we cannot overcome.
We remark that, for every graph class for which we can prove the existence of planar straight-line dominance drawings in the upcoming sections, there exist graphs in the class that do not have a dominance-expandable edge or such that the contraction of any dominance-expandable edge would result in a graph not in the same class.
3.2 Constructing Drawings by Prescribing the -Coordinates
Eades, Feg, Lin, and Nagamochi [17] and, independently, Pach and Tóth [33] proved that every upward planar drawing can be straightened while preserving the -coordinates of the vertices. This implies that every -plane graph admits an upward planar straight-line drawing with prescribed -coordinates (as long as these respect the reachability between vertices). This result was strengthened by Hong and Nagamochi [21], who proved that every internally-triconnected -plane graph admits an upward planar straight-line convex drawing with prescribed -coordinates and prescribed outer face. It is interesting that, while more constrained, drawings with prescribed -coordinates (and a prescribed outer face) allow for an easier recursive construction.
We now show that, unlike upward planar straight-line drawings, planar straight-line dominance drawings with given -coordinates do not always exist.
Theorem 2.
For every , there exists an -planar graph with vertex set such that:
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there exists a planar dominance drawing of such that , for ; and
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there exists no planar straight-line dominance drawing of such that , for .
Proof.
The -planar graph consists of the directed paths , , , and of the edges , , , and . Fig 3(a) shows a planar dominance drawing of with , for . Suppose, for a contradiction, that a planar straight-line dominance drawing of exists with , for . We prove that the plane embedding in of the underlying graph of is the one in Fig 3(a), except, possibly, for the position of the edge . Obviously, the path has a unique plane embedding. Since and are incomparable and , we have , hence the clockwise order of the vertices along the cycle is . From that, we get that the edges and lie above the path , and finally that the edge lies below the path . For any distinct , let be the ray starting at and passing through . Since , we have . Also, we have . Hence, the ray has smaller slope than the ray ; that is, such rays diverge, see Fig 3(b). Since the ray has smaller slope than , and since the ray has larger slope than , it follows that and also diverge, while they meet at , a contradiction which proves the theorem. Note that vertices only serve the purpose of creating an infinite graph family.
We can similarly show that one cannot, in general, prescribe the -coordinates of a planar straight-line dominance drawing.
Also, we can strengthen Theorem 2 by proving that, for every and for every sequence of -coordinates, there exists an -planar graph with vertex set such that there exists a planar dominance drawing of with , for , and there exists no planar straight-line dominance drawing of with , for . That is, the -coordinates prescribed by Theorem 2 do not need to be uniformly distributed.
The key point for this is the observation that the proof of Theorem 2 works as long as . Hence, we can consider the four lines , with , and then distinguish two cases. If , we let our -planar graph contain the graph from the proof of Theorem 2 and we set , for , where is the vertex set of . Otherwise, that is, if , we let our -planar graph contain the graph obtained by reversing the edge directions of the graph and we set , for , where is the vertex set of .
4 -plane -trees
A plane -tree is a plane graph recursively defined as follows. A -cycle embedded in the plane is a plane -tree. Any plane -tree with vertices can be obtained from a plane -tree with vertices by stacking a new vertex into an internal face, that is, by connecting the new vertex to the three vertices incident to the face. An -plane -tree is an -plane graph whose underlying graph is a plane -tree. In our opinion, -plane -trees constitute a very challenging class of -plane graphs for our problem. Indeed, the “natural” strategies for drawing the graphs in this class are to either recursively construct and then combine the drawings of three smaller -plane -trees, or to iteratively add a single vertex to a previously constructed drawing of a smaller -plane -tree; both these strategies do not cope well with the geometric relationship that has to be ensured for incomparable vertices. Nevertheless, in this section we show how to obtain planar straight-line dominance drawings of two classes of -plane -trees.
4.1 Upper -plane -trees
Consider the construction of an -plane -tree via repeated stacking operations. If a vertex is stacked into a face delimited by a cycle , where and are the source and the sink of the cycle, respectively, then the edge is directed from to , the edge is directed from to , while the edge might be directed either way. We say that is an upper -plane -tree if, at every stacking operation, the edge that can be directed either way is always directed towards the newly inserted vertex. We have the following.
Theorem 3.
Upper -plane -trees admit planar straight-line dominance drawings.
Proof.
Let be an -vertex upper -plane -tree whose outer face is delimited by the cycle . Let be any triangle with vertices , where and . Also, let be a closed disk in the interior of such that, for any point in , we have and ; see Figs 4(a) and 4(c). We prove by induction that admits a planar straight-line dominance drawing such that:
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lies at , lies at , and lies at ; and
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every internal vertex of lies in the interior of .
The statement clearly implies the theorem. In the base case, in which , the triangle is the required drawing of and the statement is trivially true.
Suppose now that . Let be the first stacked vertex in the construction of ; that is, is the unique vertex of adjacent to , , and . Note that the edge is directed away from , given that is an upper -plane -tree. Let , , and be the subgraphs of inside the cycles , , and , respectively. Note that is an upper -plane -tree, is an upper -plane -tree, and is an upper -plane -tree. Also, each of , , and has less than vertices. Let be any point inside and let , , and be the triangles , , and , respectively. Place at ; by the properties of , we have and , which complies with the orientation of . Let , , and be closed disks such that (see Figs 4(b) and 4(d)):
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disk lies in the interior of , disk lies in the interior of , and disk lies in the interior of ;
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for any point , we have and ; and
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for any point and any point , if the clockwise order of the vertices of is , then we have and , otherwise we have and .
Clearly, disks , , and with the above properties always exist. By induction, , , and have planar straight-line dominance drawings , , and with , , , and drawn at , , , and , respectively, so that the internal vertices of , , and lie in the interior of , , and , respectively. This results in a straight-line drawing of .
Since , , , and lie in the interior of , all the internal vertices of lie in the interior of , as required. The upward planarity of follows from the ones of , , and . In order to prove that is a dominance drawing, consider any pair of vertices and .
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If and belong to the same graph , for some , then their placement complies with their dominance relationship, by induction.
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If one of and is , say , then is a predecessor of , and indeed we have and . The case can be discussed similarly.
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If neither of and is or , and one of and is , say , then is a predecessor of , since is an upper -plane -tree. Since and , for any point , we have and .
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If is an internal vertex of and is an internal vertex of or , then is a predecessor of , since is an upper -plane -tree. Since, for any point and any point , we have and , the placement of and complies with their dominance relationship.
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Finally, if is an internal vertex of and is an internal vertex of , then and are incomparable, since is an upper -plane -tree. Since, for any point and any point , we have and , or and , the placement of and complies with their dominance relationship.
This completes the induction and the proof of the theorem.
An analogous result holds true for -plane -trees such that, at every stacking operation, the edge that can be directed either way is always directed out of the newly inserted vertex.
Trying to use a similar strategy in order to construct a planar straight-line dominance drawing of every -plane -tree might be tempting. However, the “types” of internal vertices in a general -plane -tree are more than three. Namely, referring to the notation introduced in the proof of the theorem, the internal vertices of and are not all successors of , but rather some are predecessors, some are successors, and some are incomparable to . Hence, the “three-disks schema” fails, and more complex geometric invariants seem to be needed.
4.2 Sink-dominant -plane -trees
We next look at the -plane -trees in which every stacking operation happens in a face incident to the sink of the graph. This results in an -plane -tree in which the sink is adjacent to every vertex. We call this a sink-dominant -plane -tree. It is easy to observe that every -vertex maximal -plane graph in which the sink has degree is a sink-dominant -plane -tree (and vice versa). We have the following.
Theorem 4.
Sink-dominant -plane -trees admit planar straight-line dominance drawings.
Proof.
Let be an -vertex sink-dominant -plane -tree whose outer face is delimited by the cycle .
Assumption.
If , then let be the internal vertex of adjacent to , and . If is a predecessor of , as in Fig 5(a), we add a new source adjacent to , and in the outer face of , so that the outer face of the resulting graph is delimited by the -cycle . Now is the internal vertex of adjacent to , and ; furthermore, is a successor of . Hence, by possibly adding a vertex and three edges to and changing some labels, we can assume w.l.o.g. that the internal vertex that is adjacent to the three vertices , and incident to the outer face of our input -plane -tree is a successor of .
Inductive hypothesis.
The proof is similar in spirit to, however more involved than, the proof of Theorem 3. Let be any triangle with vertices , and , where and . If lies above the line through and , we say that is of type A (see Fig 5(b)), otherwise it is of type B (see Fig 5(c)). Let and be closed disks contained in the interior of such that:
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if is of type A, then and are horizontally aligned, that is, they have the same two vertical tangents, while if is of type B, then and are vertically aligned;
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if is of type A, then is strictly below and to the right of , while if is of type B, then is strictly above and to the left of ; and
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is strictly above and to the right of .
We prove, by induction on , that admits a planar straight-line dominance drawing such that:
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lies at , lies at , and lies at ;
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every internal vertex of that is a successor of lies in the interior of ; and
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every internal vertex of that is incomparable to lies in the interior of .
Note that, because of the assumption that is a successor of , no internal vertex of is a predecessor of .
The statement clearly implies the theorem. In the base case, in which , the triangle is the required drawing of and the statement is true. Suppose now that . We only show the construction for the case in which is of Type B, as the other case is analogous.
Graph structure.
Recall that is the unique vertex of adjacent to , and , and that the edge is directed towards ; refer to Fig 6.
Let be the longest directed path from to . Since every vertex is adjacent to and since is a successor of , we have that exists and is unique. For , let be the subgraph of induced by the vertices inside or on the boundary of the -cycle and note that is a sink-dominant -plane -tree. By the fact that is the longest directed path from to , we have that, if contains internal vertices, then the internal vertex of that is adjacent to , and is a successor of . This implies that can be drawn recursively.
Also, let be the longest directed path from to in that does not pass through . For , the subgraph of induced by the vertices inside or on the boundary of the -cycle is a sink-dominant -plane -tree. Further, if contains internal vertices, then the internal vertex of that is adjacent to , and is a successor of , hence can be drawn recursively.
Since every vertex of is adjacent to , the interior of the cycle does not contain any vertices, while it might contain some edges (and in fact it does, unless ). We are going to draw as a convex curve (hence the edges in its interior will not cause crossings).
Construction.
We now draw and . We also draw disks inside the triangles representing the cycles , for , and , for , so that induction can be applied in order to draw the subgraphs and recursively. Refer to Fig 7 for an illustration of the relative placement of the vertices of and and of the desired disks.
We start by placing at the center of the disk . Next, we draw the vertices in this order inside . Let be the intersection of the horizontal line through with , and let and be the leftmost and rightmost endpoints of , respectively. For , by drawing , we complete the drawing of the triangle representing cycle . Then we also place suitable disks and inside so that can be drawn recursively.
When we have to draw , for some , we assume that (see Fig 8):
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(C1) the polygonal line is convex and lies below ;
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(C2) if , the line through and cuts in its interior, at a point ;
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(C3) if , the segment between and cuts in its interior, at a point ; and
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(C4) if , the disks and lie inside and above .
We denote by be the rightmost point of . Note that conditions (C1)–(C4) are vacuous if (i.e., before drawing ). In that case, for the sake of simplicity of the description, we let , , and coincide with .
We now explain how to draw . Let , let , where , and let be the point of with . We place at , where is sufficiently small so that conditions (C1)–(C3) are satisfied when we have to draw . Indeed, if , then would be placed at and conditions (C1)–(C3) would be trivially satisfied when we have to draw , hence they are also satisfied for some sufficiently small , by continuity.
We now place the disks and so that they have radius and centers at , where are sufficiently small so that:
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and lie inside the triangle ;
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and are lower than and ; and
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condition (C4) is satisfied when we have to draw .
Indeed, if such disks would degenerate and coincide with , which is inside and also inside , as the segment cuts at a point to the left of and the segment cuts at a point to the right of . Hence, such disks remain inside and if is sufficiently small, by continuity. Since , disks and lie above , hence ensuring condition (C4). Finally, choosing smaller than the distance between and ensures that and are lower than and .
We now draw the vertices in this order. For , when we draw , we have drawn the triangle representing cycle . Then we also show how to place suitable disks and inside so that can be drawn recursively. This is done very similarly to the way vertices and disks were drawn (see again Fig 7), so we only highlight the differences here.
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First, all such vertices and disks lie inside , rather than inside .
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Second, the role previously played by is now played by a segment along the vertical line through . The endpoints of are the lowest intersection point of with the boundary of and the intersection point of with the horizontal line through . This is because the vertices and the disks have to be placed below (and to the right of) , so to satisfy the constraints of a dominance drawing. When a vertex is drawn, the segment crosses the interior of .
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Third, the triangles are of Type A, unlike the triangles which are of Type B. Hence, the disks and are horizontally aligned, to the right of . The disks and are above and to the left of the disks and .
After the vertices and the disks have been drawn, it only remains to draw the disks and inside and the disks and inside . See Fig 9. We have to place and above and below , with in and in ; also, has to be to the right of . Analogously, we have to place and in , to the right of and to the left of , with above . Finally, has to be above and to the left of .
We can again use continuity arguments to prove that such disk placements exist. Indeed, cuts the interior of , hence can be initially set to be a point in the interior of , to the right of . Analogously, can be initially set to be a point in the interior of above . Disks and are initially set to coincide with . Now and can be moved upward of a sufficiently small distance so that does not collide with and remains below ; note that now and are in the interior of . Analogously, disks and can be moved rightward, of a sufficiently small distance so that they still are to the left of and they now both lie in the interior of . Next, we move rightward and upward so that they are to the right and above , respectively. This movement is sufficiently small so that remains in and in , and so that remains above and to the left of . Finally, we enlarge the disks so that they have a positive radius. Such a radius can be set to be sufficiently small so that all the above listed properties, which were satisfied before such an enlargement, are still maintained.
The drawing of is completed by drawing the subgraphs , recursively, with triangles representing their outer faces, and with disks inside such triangles.
Correctness.
The drawing is straight-line by construction.
The drawings of the subgraphs are planar by induction. Moreover, the construction guarantees that the cycle is represented by a convex curve which keeps in its exterior every edge from a vertex of to . It follows that distinct subgraphs among do not cross each other, that the edges inside or on the boundary of do not cross the subgraphs , and that the edges inside or on the boundary of do not cross each other. Hence, is planar.
Finally, we prove that is a dominance drawing.
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Vertices that are internal to the same subgraph among are in the correct dominance relationship, by induction.
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Vertices that are internal to distinct subgraphs among are incomparable. This is because, for any internal vertex of a subgraph or , we have that is the only vertex incident to the outer face of or , respectively, that is a successor of , as a consequence of the fact that and are the longest paths between their end-vertices. By induction, vertices that are internal to distinct subgraphs among are placed into disks among . Also, any two disks associated to distinct subgraphs among are one to the left and above the other one, hence such vertices are in the correct dominance relationship.
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By construction, are to the right and below , which is the correct dominance relationship as any vertex among is incomparable with any vertex among .
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Also by construction, we have that is above and to the right of , for , and that is above and to the right of , for , which is the correct dominance relationship because of the existence of the directed paths and .
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Each vertex with is below and to the right of every disk among and is below and to the left of every disk among ; this is indeed the correct dominance relationship, as all the vertices in the former sequence of disks are incomparable to , while all the vertices in the latter sequence of disks are successors of . That the vertices among are in the correct dominance relationship with respect to vertices inside disks can be argued similarly.
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Each vertex with is above and to the left of every disk among ; this is indeed the correct dominance relationship, as is incomparable to every vertex internal to a subgraph with , with the exception of the successors of in , which are also successors of ; these vertices are in , which is indeed above and to the right of . Similarly, each vertex with is in the correct dominance relationship with respect to every vertex internal to a subgraph with .
Clearly, an analogous result holds true for -plane -trees in which the source is adjacent to every vertex.
5 Left-non-transitive -plane graphs
We now consider left-non-transitive -plane graphs. These are the -plane graphs such that the left boundary of every face is not a single edge. We show the following.
Theorem 5.
Left-non-transitive -plane graphs admit planar straight-line dominance drawings.
Proof.
Consider a left-non-transitive -plane graph . We are going to use a right-to-left path decomposition of . This consists of a sequence of directed paths such that the following properties are satisfied.
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is the right boundary of the outer face of ;
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for , the graph is an -plane graph;
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for , the path is the left boundary of a face of whose right boundary belongs to the left boundary of the outer face of ; the internal vertices of do not belong to ; and
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.
This decomposition can be found by ordering the faces of as in a DFS of the dual of ; for a formal proof see, e.g., [29].
We are going to construct a planar straight-line dominance drawing of , for . Then is the desired drawing of .
For , let . Since is left-non-transitive, holds. The drawing of is constructed as any straight-line drawing such that and . Clearly, is a planar dominance drawing. Now suppose that a planar straight-line dominance drawing of has been constructed, for some , so that no two vertices have the same - or -coordinate. We construct a planar straight-line dominance drawing of from as follows; refer to Fig 10. Recall that and are vertices on the left boundary of , while the internal vertices of need to be inserted into in order to define . Among all the vertices of that lie to the right of in , let be the one with smallest -coordinate. Also, among all the vertices of that lie below in , let be the one with largest -coordinate. Note that and . We assign coordinates to the internal vertices of so that and . This completes the construction of .
We prove the planarity of . Since the drawing of in coincides with and since is planar, it suffices to prove that the edges of do not cross each other and do not cross . The former follows directly from the fact that and , by construction. We now deal with the latter.
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First, we prove that the edge does not cross . Let be the edge of outgoing from and incident to the left boundary of . Such an edge has the outer face of to its left, when traversed from to . By construction, we have and , hence the interval of -coordinates spanned by the edge is a subset of the one spanned by the edge and the slope of the edge is larger than the one of the edge . It follows that lies in the outer face of , and hence does not cross .
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The proof that the edge does not cross is analogous.
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Finally, consider any edge with . By construction, the interval of -coordinates spanned by is a subset of the interval , where is defined as above. Also by construction, we have that . Hence, the edge lies above the edge , thus in the outer face of , which is not crossed by it.
We now prove that is a dominance drawing. Since the drawing of in coincides with and since is a dominance drawing, it suffices to prove that the placement of the internal vertices of complies with the dominance relationships they are involved in. Consider any internal vertex of . For , vertex is a predecessor of and indeed we have and , by construction. Analogously, for , vertex is a successor of and indeed we have and , by construction. Consider any vertex of different from and .
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First, if is a predecessor of , then it is also a predecessor of and indeed we have and , given that and (since is a dominance drawing) and that and (as proved above).
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Second, if is a successor of , then it is also a successor of and indeed we have and given that and (since is a dominance drawing) and that and (as proved above).
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Finally, if is neither a predecessor of nor a successor of , then it is incomparable with . Note that , as would imply (given that is on the left boundary of ), which is not possible since is incomparable with and is a dominance drawing. Analogously, we have . By construction, we have and , hence the placement of and complies with their dominance relationship.
This concludes the proof that is a planar straight-line dominance drawing, hence the induction and the proof of the theorem.
Clearly, an analogous result holds true for right-non-transitive -plane graphs, which are -plane graphs such that the right boundary of every face is not a single edge.
6 Conclusions and Open Problems
In this paper, we tackled the following problem: Does every -plane graph admit a planar straight-line dominance drawing? While we were not able to solve this question in its generality, our research advanced the state of the art in many directions.
First, we have provided concrete evidence for the difficulty in constructing planar straight-line dominance drawings. Most notably, we proved that planar straight-line dominance drawings with prescribed -coordinates do not always exist. Our research in this direction indicates that, if an algorithm that constructs a planar straight-line dominance drawing of every -plane graph exists, then it should use substantially different ideas than known algorithms for the construction of upward planar straight-line drawings.
Second, we have described several classes of -plane graphs that admit a planar straight-line dominance drawing. A difficult benchmark here is, in our opinion, provided by the -plane -trees. Hence, we believe it would be a major milestone to understand whether these graphs always admit planar straight-line dominance drawings.
We conclude with one more open problem. Does every (undirected) maximal planar graph admit a planar straight-line dominance drawing? That is, does it admit an -orientation such that the resulting -plane graph has a planar straight-line dominance drawing?
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