Reconfiguration of Unit Squares and Disks: PSPACE-Hardness in Simple Settings
Abstract
We study well-known reconfiguration problems. Given a start and a target configuration of geometric objects in a polygon, we wonder whether we can move the objects from the start configuration to the target configuration while avoiding collisions between the objects and staying within the polygon. Problems of this type have been considered since the early 80s by roboticists and computational geometers. In this paper, we study some of the simplest possible variants where the objects are labeled or unlabeled unit squares or unit disks. In unlabeled reconfiguration, the objects are identical, so that any object is allowed to end at any of the targets positions. In the labeled variant, each object has a designated target position. The results for the labeled variants are direct consequences from our insights on the unlabeled versions.
We show that it is -hard to decide whether there exists a reconfiguration of (unlabeled/labeled) unit squares even in a simple polygon. Previously, it was only known to be -hard in a polygon with holes for both the unlabeled and labeled version [Solovey and Halperin, Int. J. Robotics Res. 2016]. Our proof is based on a result of independent interest, namely that reconfiguration between two satisfying assignments of a formula of Monotone-Planar-3-Sat is also -complete. The reduction from reconfiguration of Monotone-Planar-3-Sat to reconfiguration of unit squares extends techniques recently developed to show -hardness of packing unit squares in a simple polygon [Abrahamsen and Stade, FOCS 2024]. We also show -hardness of reconfiguration of (unlabeled/labeled) unit disks in a polygon with holes. Previously, it was known that unlabeled reconfiguration of disks of two different sizes was -hard [Brocken, van der Heijden, Kostitsyna, Lo-Wong and Surtel, FUN 2021].
Keywords and phrases:
reconfiguration, unit square, unit disk, unlabeled, labeled, simple polygon, polygonFunding:
Mikkel Abrahamsen: Supported by Independent Research Fund Denmark, grant 1054-00032B, and by the Carlsberg Foundation, grant CF24-1929.Copyright and License:
![[Uncaptioned image]](x1.png)
Lena Schlipf, André Schulz, and Jack Stade; licensed under Creative Commons License CC-BY 4.0
2012 ACM Subject Classification:
Theory of computation Computational geometry ; Theory of computation Complexity theory and logicAcknowledgements:
This work was initiated at the Dagstuhl seminar 24072: Triangulations in Geometry and Topology. We thank the organizers and the participants for the fruitful atmosphere.Editors:
Oswin Aichholzer and Haitao WangSeries and Publisher:

1 Introduction
In geometric reconfiguration we are given a start configuration of geometric objects and a desired target configuration. A particularly well-studied geometric configuration problem is multi-robot motion planning. The goal is to move the robots (or objects) from the start position to the target configuration while avoiding collisions. Problems of this type have been considered since the early 80s by roboticists and computational geometers. Hopcroft, Schwartz and Sharir [14] showed already in 1984 that reconfiguration of labeled rectangles moving in a rectangle is -hard. The motivation of their work was “to find moving systems (necessarily involving arbitrarily many degrees of freedom) whose geometry is as simple as possible, but for which the motion planning problem is still PSPACE-hard”.
In this paper, we study some of the simplest possible variants where the objects are unlabeled or labeled axis-aligned congruent squares or unit disks. In case of squares, the objects have to stay axis-aligned during the reconfiguration. For an example, consider Figure 1. Obstacles are modeled by the workspace in which the objects lie. At any time, the objects have to avoid the complement of the workspace. Depending on the variant, the workspace is given as a polygon, a simple polygon, or a grid polygon, that is an orthogonal polygon whose vertex coordinates are integers. In unlabeled reconfiguration, the objects are indistinguishable, so that any object is allowed to end at any of the target positions. In labeled reconfiguration the target position for every object is explicitly given. Table 1 presents an overview of the known results and the new results of this paper.
Contribution | Labeled | Complexity | Objects | Workspace |
[14] | yes | -hard | rectangles | rectangle |
[12] | yes | -hard | rectangles | rectangle |
[19] | yes | -hard | unit squares | polygon (with holes) |
this work | yes | -hard | unit squares | simple polygon |
[16] | yes | unit squares | grid polygon | |
[19] | no | -hard | unit squares | polygon (with holes) |
this work | no | -hard | unit squares | simple polygon |
easy exercise | no | trivial “yes” | unit squares | grid polygon |
[21] | yes | strongly -hard | disks of three sizes | simple polygon |
this work | yes | -hard | unit disks | polygon (with holes) |
[4] | no | -hard | disks of two sizes | polygon (with holes) |
this work | no | -hard | unit disks | polygon (with holes) |
Recent results of -hardness of geometric reconfiguration problems have been proven by a reduction from Nondeterministic Constrained Logic (NCL) [11, 13]. This holds for instance for the works [4, 5, 12, 19]. Here, a polygon is built “on top of” an instance of NCL, which is in itself a plane graph (the problem NCL will be described in detail in Section 2). This technique inevitably leads to a polygon with holes, because the bounded faces of the NCL-instance are turned into holes of the polygon.
A similar phenomenon appears in many proofs of -hardness of two-dimensional geometric problems where the input is a polygon: Such reductions are often from a variant of Planar-3-Sat and work by building a polygon on top of the Planar-3-Sat-instance we are reducing from. Again, this leads to a polygon with a hole for every bounded face of the graph representing the Planar-3-Sat-formula.
Abrahamsen and Stade [1] recently overcame this obstacle by making a novel reduction from Planar-3-Sat in order to obtain -hardness of the well-known problem of packing unit squares in a simple polygon; a problem that had been known to be -hard for polygons with holes since 1981 [8]. Interestingly, Abrahamsen and Stade [1] used a non-planar geometric realization of a planar formula, where variables are represented as horizontal rows and edges are vertical columns. These rows and columns are allowed to cross, but the planarity of the graph ensures that the endpoints of all rows and columns are incident to the outer face of the drawing. This makes it possible to construct a simple polygon, following the boundary of the outer face, that “implements” the functionality of the rows and columns. The rows and columns of the drawing are represented by rows and columns of squares, and these likewise cross each other in the interior of the polygon. The crucial observation is that movement in one direction does not influence movement in the other direction, so binary values can be “transported” independently in both directions through a crossing.
Our contribution.
In this paper we show -hardness of reconfiguration of unit squares in a simple polygon. To this end, we first show a result of independent interest. The solution space of boolean formulas is given by an hypercube graph, where edges are formed between assignments which differ in exactly one variable. The satisfying assignments of a formula define a subgraph of this graph, which we call . We call two satisfying assignments connected if they are connected in . The reconfiguration problem for boolean formulas asks if two satisfying assignments are connected. We show the following result.
Theorem 1.
The reconfiguration problem for Monotone-Planar-3-Sat formulas is -complete.
For some other versions of 3-Sat, the reconfiguration problem has likewise been shown to be -hard, such as Monotone-Planar-Not-All-Equal-3-SAT [6]. In Table 2, we give a summary of some variants of 3-Sat and the complexity of their satisfyability and reconfiguration problems. Interestingly, most satisfiability and reconfiguration problems are hard, but there are some exceptions that can be solved in polynomial time.
Satisfiability | Reconfiguration | |
---|---|---|
3-Sat | -complete [15] | -complete [10] |
Planar-3-Sat | -complete [17] | -complete [6] |
Positive-1-in-3-SAT | -complete [9] | (‘no’ iff assignments differ) |
Positive-Not-All-Equal-3-SAT | -complete [18] | -complete [10] |
Mon.-Planar-Not-All-Eequal-3-SAT | [18] | -complete [6] |
Monotone-Planar-3-Sat | -complete [7] | -complete [This work] |
Using Theorem 1, we show -hardness for reconfiguration of squares.
Theorem 2.
Unlabeled reconfiguration of squares in simple grid polygons is -complete.
This implies -hardness for reconfiguration of unit squares in simple polygons. We also remark that the size of the coordinates of the constructed polygon is , where is the number of corners.
In our construction, the squares can only move locally. Hence, we exactly know the start and end position of each square and also obtain the same result for the labeled version.
Corollary 3.
Labeled reconfiguration of squares in simple grid polygons is -complete.
Theorems 2 and 3 strengthen the results of Solovey and Halperin [19], who showed that the problem is -hard for polygons with holes in the unlabeled and labeled variants. In contrast, in grid polygons, it is an easy exercise to show that reconfiguration of unlabeled unit squares is always doable (if the number of squares agrees) and reconfiguration of labeled unit squares is polynomial time decidable [16]. Hence, our result is close to the border of polynomial-time decidability.
Lastly, we consider the reconfiguration of unit disks.
Theorem 4.
Reconfiguration of unlabeled unit disks in a polygon (possibly with holes) is -hard.
Before, it was only known that reconfiguration of unlabeled disks of two different sizes was -hard, as shown by Brocken, van der Heijden, Kostitsyna, Lo-Wong and Surtel [4]. For disks of the same size so far only positive results were known under the assumption that there is sufficient separation between the start and target positions of the disks in a simple polygon [2, 3] and also in a polygon with holes [20]. The main technical challenge here is to artificially discretize the continuous space of disk configurations, to avoid allowing global states in which many gadgets are locally in an “in-between” state which would break the reduction. We overcome this challenge by designing a special edge gadget that enforces the consistent orientation of an edge, and argue that only one edge may be reoriented at a time. Thus, our results in particular show that an assumption such as the separation assumption in [20] is necessary if .
In fact, our constructed polygon guarantees that no two disks may swap their positions. Therefore, hardness for the labeled version follows immediately.
Corollary 5.
Reconfiguration of labeled unit disks in a polygon (possibly with holes) is -hard.
Previously, Spikaris and Yap [21] showed NP-hardness for labeled disks of three different sizes.
Organization of the paper.
The rest of the paper is structured as follows. In Section 2, we briefly introduce NCL and and present the general idea of the -hardness proof for Monotone-Planar-3-Sat. In Section 3, we prove that the reconfiguration of unit squares in a simple polygon is -hard, by reducing from reconfiguration of Monotone-Planar-3-Sat. Finally, in Section 4, we show that the reconfiguration of unit disks in a polygon with holes is -hard, by a reduction from NCL. We conclude with a discussion in Section 5. The proofs of all statements marked by and the full proof of Theorem 1 are presented in the full version.
2 Reconfiguration of Monotone-Planar-3-Sat
Here we sketch a proof of the -hardness where we reduce from NCL. We start by reviewing the configuration-to-configuration variant of the NCL problem. An instance is given by an oriented planar cubic graph and an reorientation of . Each edge is colored red or blue, such that each vertex is incident to either three blue edges, or one blue edge and two red edge. The orientations of and need to be feasible, that is, the indegree of every vertex is at least two, where blue edges count with multiplicity 2. An NCL-instance is positive, if and only if there is a sequence of edge reversals that transforms to such that each intermediate orientation is feasible.
For the reduction we start with an embedding of and modify such that it becomes the vertex-clause-incidence graph of a formula . Any satisfying assignment of the variables of encodes a feasible orientation of and vice versa. Furthermore, if two feasible orientations of differ by the orientation of a single edge, the corresponding satisfying variable assignments differ by two variable flips. Moreover, any variable flip corresponds to two feasible orientations of that differ by at most one edge reorientation. A key idea is to replace all vertices of with one or two clause nodes and every edge with a variable node as sketched in Figure 2. A variable for an edge is true, if and only if the current orientation of matches the orientation of in .
To prove that the embedding of the variable-clause incidence graph has the required properties we have to extend . In particular, we have to ensure that on every face in the planar embedding of the clause-variable incidence graph of positive and negative clauses alternate. See the full version for all details and a full proof of Theorem 1.
3 Unit squares in simple polygons
In this section, we prove Theorem 2 by reducing Monotone-Planar-3-Sat to the unlabeled reconfiguration of squares in simple grid polygons. We start with a Monotone-Planar-3-Sat formula and two satisfying assignments and of . In our reduction, we create a grid polygon and use the assignments and to define two configurations and of squares in . We then show that there is a reconfiguration from to in if and only if there is a reconfiguration from to in . The squares are axis-aligned and may move by translations only.
3.1 Reference centers
As a preliminary step we provide a helpful tool for verifying the correctness of the reduction. Let be a grid polygon. A set of non-overlapping squares, each contained in , is called a set of reference centers for if, for any packing of squares in , each square in the packing contains one square in . Such a configuration of squares in is called perfect. For every , let be an integer in . For , let . Suppose that each is either fully contained in or is interior-disjoint with . Let be the set of those that are fully contained in . An example is shown in Figure 3. We will show that is a set of reference centers for .
Lemma 6.
Let be an square placed in . Then the area of the intersection of with is .
Lemma 7.
is a set of reference centers for .
By Lemma 7, in any reconfiguration from one perfect configuration to another, each square contains the same reference center the whole time, i.e., the squares merely shift slightly sideways and up and down around the same reference center. In order to describe the mechanics of our intended reconfigurations, we only need to consider positions of squares that are extreme or centered in each direction with respect to their reference centers. This leaves us with the nine possible positions shown in Figure 4(a). In Section 3.7, we prove that also arbitrary continuous reconfigurations in correspond to reconfigurations of , but for understanding the key ideas of the reduction, it suffices to consider these nine discrete positions.
(b) Examples of colored reference centers and how the squares containing them may move.
When the top (resp. bottom) edge of a square aligns with that of its reference center, we say that the square is down (resp. up). Otherwise, the midpoints of the reference center and the square have the same -coordinate, in which case we say that the square is vemid (abbreviation of vertically in the middle). When the left (resp. right) edge of the square aligns with that of the reference center, the square is right (resp. left). Otherwise, the midpoints of the reference center and the square have the same -coordinate, in which case we say that the square is homid (abbreviation of horizontally in the middle).
For most squares, several of the nine possible positions can be excluded, for instance due to being pushed by the boundary of or another square. In our figures, we use a color scheme for the reference centers, to make the reader aware of what possible positions a square has. The colors have the following meanings: the square can not move (pink), only move vertically (orange), only move horizontally (green), move vertically and horizontally (brown). There might exist additional restrictions on the positions that are not indicated by the colors.
3.2 Schematics of the construction
On a big scale, our construction follows the ideas of Abrahamsen and Stade [1]. Therefore, we start by reviewing the high level ideas. Let be an instance of Monotone-Planar-3-Sat with variables and consider the variable-clause-incidence graph with a suitable embedding. We now describe schematically the construction of a grid polygon . Each feasible solution to corresponds to a configuration of squares in , and there is a reconfiguration between two configurations if and only if there is a reconfiguration between the two solutions of .
In the first step, we introduce a segment representation that consists of horizontal segments for vertices and clauses, and of vertical segments for the edges of , see in Figure 5(b). The idea behind this representation is as follows: The horizontal segments will correspond to one or several rows of squares which transmit information horizontally. Similarly, the vertical segments will correspond to columns of squares that transmit information vertically. The endpoints of each segment should be on the outer face of the drawing, so that the smallest enclosing orthogonal polygon runs through all of the endpoints.
To construct the segment representation, we introduce a horizontal segment for each variable in this order bottom-up, where the -coordinates of the left and right endpoints are increasing, see Figure 5. Furthermore, the right endpoint of is to the right of the left endpoint of , so that all the segments have a common horizontal overlap. These are the primary variable rows. The positive clauses are represented by horizontal segments above and the negative clauses by horizontal segments below . We say that a clause is nested in a clause , if in the clause node of lies inside a cycle defined by two incident edges of the node of closed with a path between variable nodes. For instance, in Figure 5(a), and are nested inside . Note that the property of being nested defines a partial order. If a positive clause is nested inside , then we place the segment of above that of in the segment representation. If instead the clauses are negative, the segment of is below that of . Each edge of is realized by a vertical segment connecting the segments of and . All vertical segments to the positive clauses are placed to the right of all those to the negative clauses. The left-to-right ordering of the edges to the positive clauses along the variables in is preserved by the corresponding vertical segments, as well as the ordering of the edges to the negative clauses. The segment of a positive (resp. negative) clause starts at the top (resp. bottom) endpoint of the vertical segment corresponding to the leftmost edge incident to in and ends at the top (resp. bottom) endpoint of the rightmost edge.
In the next step, illustrated in Figure 5(c), we replace each clause segment by three auxiliary variable segments, one for each of the variables connected to the clause. In the right side of the auxiliary segments, we connect them using vertical segments to an OR gadget, represented by a red horizontal segment. As sketched in the figure, we construct (guided by the partial nested-order of the positive and negative clauses) a polygon whose boundary approximately follows the outer face of the resulting representation, but the finer details will be given later. The following lemma was proved in [1].
Lemma 8.
There is a segment representation as described, where the segments representing the OR gadgets are not crossed by any vertical segments, and all segment endpoints are incident to the outer face of the drawing.
Algebraically, the introduction of an auxiliary variable row for a clause corresponds to the following equivalence:
Here, are the primary (original) variables and are the auxiliary variables introduced for that particular clause. We remark that the formula is not monotone anymore, but the only non-monotone clauses are implications. Note that the equivalence also preserves reconfiguration: If, say, changes to false, then we change to false before changing . If changes to true, then we change to true after . For a negative clause , we use an analogous equivalence:
3.3 Components and gadgets
We informally distinguish between gadgets and components in our constructions, where a gadget is given by a set of segments on the boundary creating some simple functionality, and a component is thought of as a whole region of the polygon that can involve an arbitrary number of gadgets.
On a very high level the truth assignment of a variable of is encoded by a configuration of a so-called variable component; see Figure 6. The variable component (used to represent primary and auxiliary variables) has essentially three possible states, namely plus, minus and transitional. The first two correspond to the values true and false of a binary variable, while the truth value of the transitional state is defined to be the true/false value of the previous plus/minus state. In order to split the information represented in a variable component of a primary variable and transfer it to a variable component of an auxiliary variable we use PUSH gadgets. In particular, these gadgets are used to model the implication-clauses and they come in two versions: PUSH-UP-IF-MINUS and PUSH-DOWN-IF-PLUS. The former is used to model implications of the form , the later for . The gadgets use a vertically moving stack of square rows with growing width (called pyramid) to transmit information from primary to auxiliary variables, see for example Figure 8. For a PUSH-UP-IF-MINUS gadget representing an implication a pyramid that is raised enforces that the auxiliary variable component of is set to minus, if the variable component of is set to minus. Similarly, a PUSH-DOWN-IF-PLUS gadget modeling has the functionality that a pyramid that is lowered enforces that the auxiliary variable component of is set to plus, if the variable component of is set to plus. We will make sure that the vertically moving pyramid structure do not collide with the vertically operating variable components they “cross”. To only allow satisfying assignments for every clause we place an OR gadget that is connected with the corresponding auxiliary variable components. We reuse the ideas for the PUSH Gadgets. For a clause the auxiliary variables will push a pyramid up into the clause gadget if the corresponding auxiliary variable is set to minus. The OR gadget has only room for two of these pyramids to push up. The clauses are handled symmetrically. Here, an auxiliary variable set to plus would result in a pyramid pushing down and the OR gadget can only incorporate two lowered pyramids.
We continue with describing the gadgets and components in detail.
3.4 The variable component
The variable component has two main rows of squares and an arbitrary number of PUSH gadgets, ensuring dependency between the primary and auxiliary variables and between the auxiliary variables and the OR gadgets. The PUSH gadgets require the introduction of helper rows padded along the main rows, above the top row or below the bottom row. The construction of PUSH gadgets and helper rows will be explained in later sections.
The construction of the main rows of a variable component is shown in Figure 6. A perfect configuration of the component has three possible states, as defined by the horizontal position of the two rightmost squares (covering the brown reference centers). Note that none of the two squares can push right, and if one is homid, the other needs to be right.
If the bottom is in the homid position, the state is plus. If the top is in the homid position, the state is minus. Otherwise, the state is transitional.
Now we describe what happens when a block of raised or lowered squares “crosses” a variable component. As discussed before, pyramids made of such blocks are used to create dependencies between two variable components, but it is important that they can cross other variable components without interacting with them.
When a stack of raised squares crosses a row of squares with a different horizontal alignment, the stack of raised squares will grow in width. Hence, the stack will be pyramid shaped if all rows have a different alignment than the neighboring rows. It is important that we know the width of a pyramid when it reaches the target variable component where it will end. Thus, we need to know exactly how many times the width is increased and which squares are raised in the top row. To this end, and in order to create a necessary amount of vertical spacing, we introduce static rows in between all neighboring pairs of variable components. A static row consists of squares in the beginning and in the end, which cannot move, and some squares in the middle, which can move vertically up and down, see Figure 7.
So in particular, all squares in a static row have a fixed horizontal position.
We ensure that the fixed horizontal position is never aligned with the rows of the variable component. Furthermore, the top row of a variable component is never aligned with the bottom row, see Figure 8. Hence, when a pyramid crosses a variable component, the specific horizontal positions of the rows do not affect which squares are raised/lowered on the other side of the variable. This is expressed in the following lemma.
Lemma 9.
Consider a perfect configuration. If a block of consecutive squares in a static row below (above) a variable component are up (down), then the corresponding squares in the static row above (below) the variable component must also be up (down) as well as two extra squares on the right (left) and one on the left (right).
Recall that there may be helper rows above or below the main rows of a variable component, which will be explained in more detail in Section 3.5. Conceivably, these could be unaligned with the main rows, which would cause a pyramid to grow more in width when crossing the variable. However, if they are aligned (which is our “intended behavior” of the helper rows), then the width will not grow beyond what is expressed by Lemma 9.
3.5 PUSH gadgets and helper rows
Figures 9 and 10 show the PUSH-UP-IF-MINUS and PUSH-DOWN-IF-PLUS gadgets, respectively. The gadgets are mirror images of each other by a horizontal axis. In order to make PUSH gadgets, we need a square that is pushed up or down only when it is left. To this end, we introduce helper rows, which are extra rows above and below the main variable rows. Consider the PUSH-UP-IF-MINUS gadget, shown in Figure 9. If the squares of the lower main row are left, the squares of the helper row will be left as well, because the square presses down , which thus pushes to the left. Therefore the square will be up, and a pyramid of raised squares is created.
The PUSH-DOWN-IF-PLUS gadget works by analogous mechanics. If the squares in the upper main row are left, two squares of the lower row are pushed down, see Figure 10.
All helper rows are created at the right end of the variable gadget and end at a PUSH gadget. Figure 11 shows schematically where the helper rows are placed, and Figure 12 shows a detailed example with multiple helper rows. Note that with multiple helper rows, the same principle is used as with a single helper row in order to ensure that when the lower main row is left, then all helper rows below are also left, so they all create pyramids of raised squares.
We now describe how a pyramid ends at an auxiliary variable component; see Figure 13 for a concrete example to support the description. When we make a PUSH-UP-IF-MINUS gadget from a primary variable to an auxiliary variable , we create a pocket in the boundary of along the upper primary row of to enable the squares of the pyramid to raise. We place the pocket so that the squares can only raise if they are homid (and if the pyramid has grown in width by exactly three squares every time it crossed another variable component). Thus, the rightmost square of the top row of is also homid, so must be minus. We have thus made the implication .
In minus, pyramids are created to the positive auxiliary variables, which in turn create pyramids to the positive clauses. Likewise, in plus, pyramids are created to the negative clauses. In transitional, pyramids are created to all clauses. As we will see in Section 3.6, there will only be room for two pyramids for each clause. Hence, each clause ensures that one of the variables is in the plus/minus state that represents the true/false value that satisfies the clause. This gives the following lemma.
Lemma 10.
In every perfect configuration, the following holds. If a variable is not plus (minus), a pyramid of raised squares appears from any PUSH-UP-IF-MINUS (PUSH-DOWN-IF-PLUS) gadget, and if the pyramid is received by an auxiliary variable, that variable must be minus (plus). As a consequence, we can realize the implications and , i.e., ensure that the values of variables encoded by the configuration satisfy the implications.
3.6 OR gadget
Figure 14 shows the positive OR gadget. The gadget is connected to three auxiliary variable components. Using PUSH-UP-IF-MINUS gadgets, pyramids can raise from the variables and end in the OR gadget. The gadget allows for two pyramids to be raised, but not all three at once. Hence, one variable must be plus. When at most one pyramid is raised, the squares in the top of the gadget can reconfigure so that there is room for any of the other two pyramids to raise. An example is shown in the figure – the reader can easily check that it is likewise possible in the other five cases where one pyramid is raised and we need to make room for one of the other two to raise as well. This corresponds to a reconfiguration of the formula : If is a clause and one of the variables, say , changes from positive to negative, then or must have been positive before changes (otherwise the clause would not be satisfied after changing). Hence, there was only one pyramid, so the squares in the gadget can reconfigure to accommodate raising the pyramid from .
Figure 15 shows how the OR gadget is connected to the variable components. The negative OR gadget is obtained by reflection along a horizontal axis.
Lemma 11.
In a positive OR gadget, at least one of the connected auxiliary variables is plus. In a negative OR gadget, at least one of the connected auxiliary variables is minus.
3.7 Verification
Recall that we start with a Monotone-Planar-3-Sat formula and two satisfying assignments and of . In our reduction, we create a polygon as described. We define start and target configurations and according to and : We place squares in all primary and auxiliary variable components in in the plus/minus state corresponding to the value of the variable in . By construction there is room for the pyramids created by PUSH gadgets. We now need to verify that there is a reconfiguration between and in if and only if there is one between and in . This is expressed by the following two lemmas.
Lemma 12.
If has a reconfiguration between two satisfying assignments and , then there is also a reconfiguration between the corresponding start and target configurations and in .
Lemma 13.
If there is a reconfiguration in from the start configuration to the target in , then there is a reconfiguration in the formula from the satisfying assignment to .
Finally, we prove the containment in .
Lemma 14.
Unlabeled reconfiguration of squares in simple grid polygons is contained in .
Theorem 2 result now follows from Theorems 1, 12, 13, and 14.
As we only consider perfect configurations in our reduction, by Lemma 7 each square always contains its reference center. Thus, we can easily label each square and obtain hardness for the labeled variant, i.e., Corollary 3.
4 Unit disks in polygons with holes
We now present the ideas for showing -hard of reconfiguration of unit disks in a polygon possibly with holes. As a first step, we prove it for an arc-gon, that is, a shape whose boundary consists of straight line segments and circular arcs.
Proposition 15.
Reconfiguration of unlabeled unit disk robots in an arc-gon is -hard.
Proof-Sketch.
As in Section 2, we reduce from the configuration-to-configuration variant of Nondeterministic Constrained Logic (NCL) [11, 12, 13]. From a given NCL instance, specified by two orientations of a plane cubic graph and a reorientation , we construct an arc-gon and two configurations of unit disks such that the NCL instance is a yes-instance if and only of the two configurations of unit disks can be reconfigured into one another.
Similar to [4], we lay out using five types of tiles as illustrated in Figure 16. Here we ensure that each edge has a at least one straight tile.
Each tile is then realized as a room, where small “hooks” limit the movement of the disks in the opening of the room which is called the door of the room, see Figures 17(a) and 17(b).
The interiors of the rooms mimic the behavior of the vertices and edges of during a reconfiguration, see Figure 18. In particular, it is essential to guarantee that an edge can only have one orientation at a time; we implement this in our straight tile gadget where we guarantee that at least one door disks is “pushed out” and implies that the AND and OR tiles behave as required, see Figure 19.
Then, we turn the arc-gon constructed in the proof of Proposition 15 into a polygon with holes and thereby complete the proof of Theorem 4. Observing that no two disks may swap within the polygon implies -hardness for the labeled variant, i.e., Corollary 5.
5 Discussion
We proved that reconfiguration of Monotone-Planar-3-Sat is -hard, and thereby complemented a sequence of recent results establishing the relationships between 3-Sat variants and their reconfiguration counterparts. This result was a stepping stone towards showing -hardness of reconfiguration of -squares in a simple grid polygon. While the reduction reuses ideas from Abrahamsen and Stade [1], we also needed several new ideas. Most importantly, the reduction to the packing problem uses very rigid configurations whereas our setting inherently requires to allow for some movements. While the computational complexity of reconfiguring -squares in simple grid polygons is trivial for , the cases remain an interesting open problem.
We have also shown that reconfiguration of unit disks in a polygon with holes is -hard. A natural next question is unit disks in a simple polygon. At a first glance, it seems difficult to extend our insights in the square setting to this case, because it is troublesome to propagate movement independently in multiple directions in a large region filled with disks. Therefore, we expect that a -hardness proof, if it exists, will likely require different techniques.
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